Mercurial > hg > truffle
annotate src/share/vm/runtime/synchronizer.cpp @ 1640:bfc89697cccb
6964164: MonitorInUseLists leak of contended objects
Summary: fix MonitorInUseLists memory leak and MonitorBound now works
Reviewed-by: chrisphi, dice
| author | acorn |
|---|---|
| date | Fri, 02 Jul 2010 17:23:43 -0400 |
| parents | 3a9de63b2209 |
| children | fa83ab460c54 |
| rev | line source |
|---|---|
| 0 | 1 /* |
|
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2 * Copyright (c) 1998, 2009, Oracle and/or its affiliates. All rights reserved. |
| 0 | 3 * DO NOT ALTER OR REMOVE COPYRIGHT NOTICES OR THIS FILE HEADER. |
| 4 * | |
| 5 * This code is free software; you can redistribute it and/or modify it | |
| 6 * under the terms of the GNU General Public License version 2 only, as | |
| 7 * published by the Free Software Foundation. | |
| 8 * | |
| 9 * This code is distributed in the hope that it will be useful, but WITHOUT | |
| 10 * ANY WARRANTY; without even the implied warranty of MERCHANTABILITY or | |
| 11 * FITNESS FOR A PARTICULAR PURPOSE. See the GNU General Public License | |
| 12 * version 2 for more details (a copy is included in the LICENSE file that | |
| 13 * accompanied this code). | |
| 14 * | |
| 15 * You should have received a copy of the GNU General Public License version | |
| 16 * 2 along with this work; if not, write to the Free Software Foundation, | |
| 17 * Inc., 51 Franklin St, Fifth Floor, Boston, MA 02110-1301 USA. | |
| 18 * | |
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19 * Please contact Oracle, 500 Oracle Parkway, Redwood Shores, CA 94065 USA |
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20 * or visit www.oracle.com if you need additional information or have any |
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21 * questions. |
| 0 | 22 * |
| 23 */ | |
| 24 | |
| 25 # include "incls/_precompiled.incl" | |
| 26 # include "incls/_synchronizer.cpp.incl" | |
| 27 | |
| 28 #if defined(__GNUC__) && !defined(IA64) | |
| 29 // Need to inhibit inlining for older versions of GCC to avoid build-time failures | |
| 30 #define ATTR __attribute__((noinline)) | |
| 31 #else | |
| 32 #define ATTR | |
| 33 #endif | |
| 34 | |
| 35 // Native markword accessors for synchronization and hashCode(). | |
| 36 // | |
| 37 // The "core" versions of monitor enter and exit reside in this file. | |
| 38 // The interpreter and compilers contain specialized transliterated | |
| 39 // variants of the enter-exit fast-path operations. See i486.ad fast_lock(), | |
| 40 // for instance. If you make changes here, make sure to modify the | |
| 41 // interpreter, and both C1 and C2 fast-path inline locking code emission. | |
| 42 // | |
| 43 // TODO: merge the objectMonitor and synchronizer classes. | |
| 44 // | |
| 45 // ----------------------------------------------------------------------------- | |
| 46 | |
| 47 #ifdef DTRACE_ENABLED | |
| 48 | |
| 49 // Only bother with this argument setup if dtrace is available | |
| 50 // TODO-FIXME: probes should not fire when caller is _blocked. assert() accordingly. | |
| 51 | |
| 52 HS_DTRACE_PROBE_DECL5(hotspot, monitor__wait, | |
| 53 jlong, uintptr_t, char*, int, long); | |
| 54 HS_DTRACE_PROBE_DECL4(hotspot, monitor__waited, | |
| 55 jlong, uintptr_t, char*, int); | |
| 56 HS_DTRACE_PROBE_DECL4(hotspot, monitor__notify, | |
| 57 jlong, uintptr_t, char*, int); | |
| 58 HS_DTRACE_PROBE_DECL4(hotspot, monitor__notifyAll, | |
| 59 jlong, uintptr_t, char*, int); | |
| 60 HS_DTRACE_PROBE_DECL4(hotspot, monitor__contended__enter, | |
| 61 jlong, uintptr_t, char*, int); | |
| 62 HS_DTRACE_PROBE_DECL4(hotspot, monitor__contended__entered, | |
| 63 jlong, uintptr_t, char*, int); | |
| 64 HS_DTRACE_PROBE_DECL4(hotspot, monitor__contended__exit, | |
| 65 jlong, uintptr_t, char*, int); | |
| 66 | |
| 67 #define DTRACE_MONITOR_PROBE_COMMON(klassOop, thread) \ | |
| 68 char* bytes = NULL; \ | |
| 69 int len = 0; \ | |
| 70 jlong jtid = SharedRuntime::get_java_tid(thread); \ | |
| 71 symbolOop klassname = ((oop)(klassOop))->klass()->klass_part()->name(); \ | |
| 72 if (klassname != NULL) { \ | |
| 73 bytes = (char*)klassname->bytes(); \ | |
| 74 len = klassname->utf8_length(); \ | |
| 75 } | |
| 76 | |
| 77 #define DTRACE_MONITOR_WAIT_PROBE(monitor, klassOop, thread, millis) \ | |
| 78 { \ | |
| 79 if (DTraceMonitorProbes) { \ | |
| 80 DTRACE_MONITOR_PROBE_COMMON(klassOop, thread); \ | |
| 81 HS_DTRACE_PROBE5(hotspot, monitor__wait, jtid, \ | |
| 82 (monitor), bytes, len, (millis)); \ | |
| 83 } \ | |
| 84 } | |
| 85 | |
| 86 #define DTRACE_MONITOR_PROBE(probe, monitor, klassOop, thread) \ | |
| 87 { \ | |
| 88 if (DTraceMonitorProbes) { \ | |
| 89 DTRACE_MONITOR_PROBE_COMMON(klassOop, thread); \ | |
| 90 HS_DTRACE_PROBE4(hotspot, monitor__##probe, jtid, \ | |
| 91 (uintptr_t)(monitor), bytes, len); \ | |
| 92 } \ | |
| 93 } | |
| 94 | |
| 95 #else // ndef DTRACE_ENABLED | |
| 96 | |
| 97 #define DTRACE_MONITOR_WAIT_PROBE(klassOop, thread, millis, mon) {;} | |
| 98 #define DTRACE_MONITOR_PROBE(probe, klassOop, thread, mon) {;} | |
| 99 | |
| 100 #endif // ndef DTRACE_ENABLED | |
| 101 | |
| 102 // ObjectWaiter serves as a "proxy" or surrogate thread. | |
| 103 // TODO-FIXME: Eliminate ObjectWaiter and use the thread-specific | |
| 104 // ParkEvent instead. Beware, however, that the JVMTI code | |
| 105 // knows about ObjectWaiters, so we'll have to reconcile that code. | |
| 106 // See next_waiter(), first_waiter(), etc. | |
| 107 | |
| 108 class ObjectWaiter : public StackObj { | |
| 109 public: | |
| 110 enum TStates { TS_UNDEF, TS_READY, TS_RUN, TS_WAIT, TS_ENTER, TS_CXQ } ; | |
| 111 enum Sorted { PREPEND, APPEND, SORTED } ; | |
| 112 ObjectWaiter * volatile _next; | |
| 113 ObjectWaiter * volatile _prev; | |
| 114 Thread* _thread; | |
| 115 ParkEvent * _event; | |
| 116 volatile int _notified ; | |
| 117 volatile TStates TState ; | |
| 118 Sorted _Sorted ; // List placement disposition | |
| 119 bool _active ; // Contention monitoring is enabled | |
| 120 public: | |
| 121 ObjectWaiter(Thread* thread) { | |
| 122 _next = NULL; | |
| 123 _prev = NULL; | |
| 124 _notified = 0; | |
| 125 TState = TS_RUN ; | |
| 126 _thread = thread; | |
| 127 _event = thread->_ParkEvent ; | |
| 128 _active = false; | |
| 129 assert (_event != NULL, "invariant") ; | |
| 130 } | |
| 131 | |
| 132 void wait_reenter_begin(ObjectMonitor *mon) { | |
| 133 JavaThread *jt = (JavaThread *)this->_thread; | |
| 134 _active = JavaThreadBlockedOnMonitorEnterState::wait_reenter_begin(jt, mon); | |
| 135 } | |
| 136 | |
| 137 void wait_reenter_end(ObjectMonitor *mon) { | |
| 138 JavaThread *jt = (JavaThread *)this->_thread; | |
| 139 JavaThreadBlockedOnMonitorEnterState::wait_reenter_end(jt, _active); | |
| 140 } | |
| 141 }; | |
| 142 | |
| 143 enum ManifestConstants { | |
| 144 ClearResponsibleAtSTW = 0, | |
| 145 MaximumRecheckInterval = 1000 | |
| 146 } ; | |
| 147 | |
| 148 | |
| 149 #undef TEVENT | |
| 150 #define TEVENT(nom) {if (SyncVerbose) FEVENT(nom); } | |
| 151 | |
| 152 #define FEVENT(nom) { static volatile int ctr = 0 ; int v = ++ctr ; if ((v & (v-1)) == 0) { ::printf (#nom " : %d \n", v); ::fflush(stdout); }} | |
| 153 | |
| 154 #undef TEVENT | |
| 155 #define TEVENT(nom) {;} | |
| 156 | |
| 157 // Performance concern: | |
| 158 // OrderAccess::storestore() calls release() which STs 0 into the global volatile | |
| 159 // OrderAccess::Dummy variable. This store is unnecessary for correctness. | |
| 160 // Many threads STing into a common location causes considerable cache migration | |
| 161 // or "sloshing" on large SMP system. As such, I avoid using OrderAccess::storestore() | |
| 162 // until it's repaired. In some cases OrderAccess::fence() -- which incurs local | |
| 163 // latency on the executing processor -- is a better choice as it scales on SMP | |
| 164 // systems. See http://blogs.sun.com/dave/entry/biased_locking_in_hotspot for a | |
| 165 // discussion of coherency costs. Note that all our current reference platforms | |
| 166 // provide strong ST-ST order, so the issue is moot on IA32, x64, and SPARC. | |
| 167 // | |
| 168 // As a general policy we use "volatile" to control compiler-based reordering | |
| 169 // and explicit fences (barriers) to control for architectural reordering performed | |
| 170 // by the CPU(s) or platform. | |
| 171 | |
| 172 static int MBFence (int x) { OrderAccess::fence(); return x; } | |
| 173 | |
| 174 struct SharedGlobals { | |
| 175 // These are highly shared mostly-read variables. | |
| 176 // To avoid false-sharing they need to be the sole occupants of a $ line. | |
| 177 double padPrefix [8]; | |
| 178 volatile int stwRandom ; | |
| 179 volatile int stwCycle ; | |
| 180 | |
| 181 // Hot RW variables -- Sequester to avoid false-sharing | |
| 182 double padSuffix [16]; | |
| 183 volatile int hcSequence ; | |
| 184 double padFinal [8] ; | |
| 185 } ; | |
| 186 | |
| 187 static SharedGlobals GVars ; | |
| 1587 | 188 static int MonitorScavengeThreshold = 1000000 ; |
| 189 static volatile int ForceMonitorScavenge = 0 ; // Scavenge required and pending | |
| 0 | 190 |
| 191 | |
| 192 // Tunables ... | |
| 193 // The knob* variables are effectively final. Once set they should | |
| 194 // never be modified hence. Consider using __read_mostly with GCC. | |
| 195 | |
| 196 static int Knob_LogSpins = 0 ; // enable jvmstat tally for spins | |
| 197 static int Knob_HandOff = 0 ; | |
| 198 static int Knob_Verbose = 0 ; | |
| 199 static int Knob_ReportSettings = 0 ; | |
| 200 | |
| 201 static int Knob_SpinLimit = 5000 ; // derived by an external tool - | |
| 202 static int Knob_SpinBase = 0 ; // Floor AKA SpinMin | |
| 203 static int Knob_SpinBackOff = 0 ; // spin-loop backoff | |
| 204 static int Knob_CASPenalty = -1 ; // Penalty for failed CAS | |
| 205 static int Knob_OXPenalty = -1 ; // Penalty for observed _owner change | |
| 206 static int Knob_SpinSetSucc = 1 ; // spinners set the _succ field | |
| 207 static int Knob_SpinEarly = 1 ; | |
| 208 static int Knob_SuccEnabled = 1 ; // futile wake throttling | |
| 209 static int Knob_SuccRestrict = 0 ; // Limit successors + spinners to at-most-one | |
| 210 static int Knob_MaxSpinners = -1 ; // Should be a function of # CPUs | |
| 211 static int Knob_Bonus = 100 ; // spin success bonus | |
| 212 static int Knob_BonusB = 100 ; // spin success bonus | |
| 213 static int Knob_Penalty = 200 ; // spin failure penalty | |
| 214 static int Knob_Poverty = 1000 ; | |
| 215 static int Knob_SpinAfterFutile = 1 ; // Spin after returning from park() | |
| 216 static int Knob_FixedSpin = 0 ; | |
| 217 static int Knob_OState = 3 ; // Spinner checks thread state of _owner | |
| 218 static int Knob_UsePause = 1 ; | |
| 219 static int Knob_ExitPolicy = 0 ; | |
| 220 static int Knob_PreSpin = 10 ; // 20-100 likely better | |
| 221 static int Knob_ResetEvent = 0 ; | |
| 222 static int BackOffMask = 0 ; | |
| 223 | |
| 224 static int Knob_FastHSSEC = 0 ; | |
| 225 static int Knob_MoveNotifyee = 2 ; // notify() - disposition of notifyee | |
| 226 static int Knob_QMode = 0 ; // EntryList-cxq policy - queue discipline | |
| 227 static volatile int InitDone = 0 ; | |
| 228 | |
| 229 | |
| 230 // hashCode() generation : | |
| 231 // | |
| 232 // Possibilities: | |
| 233 // * MD5Digest of {obj,stwRandom} | |
| 234 // * CRC32 of {obj,stwRandom} or any linear-feedback shift register function. | |
| 235 // * A DES- or AES-style SBox[] mechanism | |
| 236 // * One of the Phi-based schemes, such as: | |
| 237 // 2654435761 = 2^32 * Phi (golden ratio) | |
| 238 // HashCodeValue = ((uintptr_t(obj) >> 3) * 2654435761) ^ GVars.stwRandom ; | |
| 239 // * A variation of Marsaglia's shift-xor RNG scheme. | |
| 240 // * (obj ^ stwRandom) is appealing, but can result | |
| 241 // in undesirable regularity in the hashCode values of adjacent objects | |
| 242 // (objects allocated back-to-back, in particular). This could potentially | |
| 243 // result in hashtable collisions and reduced hashtable efficiency. | |
| 244 // There are simple ways to "diffuse" the middle address bits over the | |
| 245 // generated hashCode values: | |
| 246 // | |
| 247 | |
| 248 static inline intptr_t get_next_hash(Thread * Self, oop obj) { | |
| 249 intptr_t value = 0 ; | |
| 250 if (hashCode == 0) { | |
| 251 // This form uses an unguarded global Park-Miller RNG, | |
| 252 // so it's possible for two threads to race and generate the same RNG. | |
| 253 // On MP system we'll have lots of RW access to a global, so the | |
| 254 // mechanism induces lots of coherency traffic. | |
| 255 value = os::random() ; | |
| 256 } else | |
| 257 if (hashCode == 1) { | |
| 258 // This variation has the property of being stable (idempotent) | |
| 259 // between STW operations. This can be useful in some of the 1-0 | |
| 260 // synchronization schemes. | |
| 261 intptr_t addrBits = intptr_t(obj) >> 3 ; | |
| 262 value = addrBits ^ (addrBits >> 5) ^ GVars.stwRandom ; | |
| 263 } else | |
| 264 if (hashCode == 2) { | |
| 265 value = 1 ; // for sensitivity testing | |
| 266 } else | |
| 267 if (hashCode == 3) { | |
| 268 value = ++GVars.hcSequence ; | |
| 269 } else | |
| 270 if (hashCode == 4) { | |
| 271 value = intptr_t(obj) ; | |
| 272 } else { | |
| 273 // Marsaglia's xor-shift scheme with thread-specific state | |
| 274 // This is probably the best overall implementation -- we'll | |
| 275 // likely make this the default in future releases. | |
| 276 unsigned t = Self->_hashStateX ; | |
| 277 t ^= (t << 11) ; | |
| 278 Self->_hashStateX = Self->_hashStateY ; | |
| 279 Self->_hashStateY = Self->_hashStateZ ; | |
| 280 Self->_hashStateZ = Self->_hashStateW ; | |
| 281 unsigned v = Self->_hashStateW ; | |
| 282 v = (v ^ (v >> 19)) ^ (t ^ (t >> 8)) ; | |
| 283 Self->_hashStateW = v ; | |
| 284 value = v ; | |
| 285 } | |
| 286 | |
| 287 value &= markOopDesc::hash_mask; | |
| 288 if (value == 0) value = 0xBAD ; | |
| 289 assert (value != markOopDesc::no_hash, "invariant") ; | |
| 290 TEVENT (hashCode: GENERATE) ; | |
| 291 return value; | |
| 292 } | |
| 293 | |
| 294 void BasicLock::print_on(outputStream* st) const { | |
| 295 st->print("monitor"); | |
| 296 } | |
| 297 | |
| 298 void BasicLock::move_to(oop obj, BasicLock* dest) { | |
| 299 // Check to see if we need to inflate the lock. This is only needed | |
| 300 // if an object is locked using "this" lightweight monitor. In that | |
| 301 // case, the displaced_header() is unlocked, because the | |
| 302 // displaced_header() contains the header for the originally unlocked | |
| 303 // object. However the object could have already been inflated. But it | |
| 304 // does not matter, the inflation will just a no-op. For other cases, | |
| 305 // the displaced header will be either 0x0 or 0x3, which are location | |
| 306 // independent, therefore the BasicLock is free to move. | |
| 307 // | |
| 308 // During OSR we may need to relocate a BasicLock (which contains a | |
| 309 // displaced word) from a location in an interpreter frame to a | |
| 310 // new location in a compiled frame. "this" refers to the source | |
| 311 // basiclock in the interpreter frame. "dest" refers to the destination | |
| 312 // basiclock in the new compiled frame. We *always* inflate in move_to(). | |
| 313 // The always-Inflate policy works properly, but in 1.5.0 it can sometimes | |
| 314 // cause performance problems in code that makes heavy use of a small # of | |
| 315 // uncontended locks. (We'd inflate during OSR, and then sync performance | |
| 316 // would subsequently plummet because the thread would be forced thru the slow-path). | |
| 317 // This problem has been made largely moot on IA32 by inlining the inflated fast-path | |
| 318 // operations in Fast_Lock and Fast_Unlock in i486.ad. | |
| 319 // | |
| 320 // Note that there is a way to safely swing the object's markword from | |
| 321 // one stack location to another. This avoids inflation. Obviously, | |
| 322 // we need to ensure that both locations refer to the current thread's stack. | |
| 323 // There are some subtle concurrency issues, however, and since the benefit is | |
| 324 // is small (given the support for inflated fast-path locking in the fast_lock, etc) | |
| 325 // we'll leave that optimization for another time. | |
| 326 | |
| 327 if (displaced_header()->is_neutral()) { | |
| 328 ObjectSynchronizer::inflate_helper(obj); | |
| 329 // WARNING: We can not put check here, because the inflation | |
| 330 // will not update the displaced header. Once BasicLock is inflated, | |
| 331 // no one should ever look at its content. | |
| 332 } else { | |
| 333 // Typically the displaced header will be 0 (recursive stack lock) or | |
| 334 // unused_mark. Naively we'd like to assert that the displaced mark | |
| 335 // value is either 0, neutral, or 3. But with the advent of the | |
| 336 // store-before-CAS avoidance in fast_lock/compiler_lock_object | |
| 337 // we can find any flavor mark in the displaced mark. | |
| 338 } | |
| 339 // [RGV] The next line appears to do nothing! | |
| 340 intptr_t dh = (intptr_t) displaced_header(); | |
| 341 dest->set_displaced_header(displaced_header()); | |
| 342 } | |
| 343 | |
| 344 // ----------------------------------------------------------------------------- | |
| 345 | |
| 346 // standard constructor, allows locking failures | |
| 347 ObjectLocker::ObjectLocker(Handle obj, Thread* thread, bool doLock) { | |
| 348 _dolock = doLock; | |
| 349 _thread = thread; | |
| 350 debug_only(if (StrictSafepointChecks) _thread->check_for_valid_safepoint_state(false);) | |
| 351 _obj = obj; | |
| 352 | |
| 353 if (_dolock) { | |
| 354 TEVENT (ObjectLocker) ; | |
| 355 | |
| 356 ObjectSynchronizer::fast_enter(_obj, &_lock, false, _thread); | |
| 357 } | |
| 358 } | |
| 359 | |
| 360 ObjectLocker::~ObjectLocker() { | |
| 361 if (_dolock) { | |
| 362 ObjectSynchronizer::fast_exit(_obj(), &_lock, _thread); | |
| 363 } | |
| 364 } | |
| 365 | |
| 366 // ----------------------------------------------------------------------------- | |
| 367 | |
| 368 | |
| 369 PerfCounter * ObjectSynchronizer::_sync_Inflations = NULL ; | |
| 370 PerfCounter * ObjectSynchronizer::_sync_Deflations = NULL ; | |
| 371 PerfCounter * ObjectSynchronizer::_sync_ContendedLockAttempts = NULL ; | |
| 372 PerfCounter * ObjectSynchronizer::_sync_FutileWakeups = NULL ; | |
| 373 PerfCounter * ObjectSynchronizer::_sync_Parks = NULL ; | |
| 374 PerfCounter * ObjectSynchronizer::_sync_EmptyNotifications = NULL ; | |
| 375 PerfCounter * ObjectSynchronizer::_sync_Notifications = NULL ; | |
| 376 PerfCounter * ObjectSynchronizer::_sync_PrivateA = NULL ; | |
| 377 PerfCounter * ObjectSynchronizer::_sync_PrivateB = NULL ; | |
| 378 PerfCounter * ObjectSynchronizer::_sync_SlowExit = NULL ; | |
| 379 PerfCounter * ObjectSynchronizer::_sync_SlowEnter = NULL ; | |
| 380 PerfCounter * ObjectSynchronizer::_sync_SlowNotify = NULL ; | |
| 381 PerfCounter * ObjectSynchronizer::_sync_SlowNotifyAll = NULL ; | |
| 382 PerfCounter * ObjectSynchronizer::_sync_FailedSpins = NULL ; | |
| 383 PerfCounter * ObjectSynchronizer::_sync_SuccessfulSpins = NULL ; | |
| 384 PerfCounter * ObjectSynchronizer::_sync_MonInCirculation = NULL ; | |
| 385 PerfCounter * ObjectSynchronizer::_sync_MonScavenged = NULL ; | |
| 386 PerfLongVariable * ObjectSynchronizer::_sync_MonExtant = NULL ; | |
| 387 | |
| 388 // One-shot global initialization for the sync subsystem. | |
| 389 // We could also defer initialization and initialize on-demand | |
| 390 // the first time we call inflate(). Initialization would | |
| 391 // be protected - like so many things - by the MonitorCache_lock. | |
| 392 | |
| 393 void ObjectSynchronizer::Initialize () { | |
| 394 static int InitializationCompleted = 0 ; | |
| 395 assert (InitializationCompleted == 0, "invariant") ; | |
| 396 InitializationCompleted = 1 ; | |
| 397 if (UsePerfData) { | |
| 398 EXCEPTION_MARK ; | |
| 399 #define NEWPERFCOUNTER(n) {n = PerfDataManager::create_counter(SUN_RT, #n, PerfData::U_Events,CHECK); } | |
| 400 #define NEWPERFVARIABLE(n) {n = PerfDataManager::create_variable(SUN_RT, #n, PerfData::U_Events,CHECK); } | |
| 401 NEWPERFCOUNTER(_sync_Inflations) ; | |
| 402 NEWPERFCOUNTER(_sync_Deflations) ; | |
| 403 NEWPERFCOUNTER(_sync_ContendedLockAttempts) ; | |
| 404 NEWPERFCOUNTER(_sync_FutileWakeups) ; | |
| 405 NEWPERFCOUNTER(_sync_Parks) ; | |
| 406 NEWPERFCOUNTER(_sync_EmptyNotifications) ; | |
| 407 NEWPERFCOUNTER(_sync_Notifications) ; | |
| 408 NEWPERFCOUNTER(_sync_SlowEnter) ; | |
| 409 NEWPERFCOUNTER(_sync_SlowExit) ; | |
| 410 NEWPERFCOUNTER(_sync_SlowNotify) ; | |
| 411 NEWPERFCOUNTER(_sync_SlowNotifyAll) ; | |
| 412 NEWPERFCOUNTER(_sync_FailedSpins) ; | |
| 413 NEWPERFCOUNTER(_sync_SuccessfulSpins) ; | |
| 414 NEWPERFCOUNTER(_sync_PrivateA) ; | |
| 415 NEWPERFCOUNTER(_sync_PrivateB) ; | |
| 416 NEWPERFCOUNTER(_sync_MonInCirculation) ; | |
| 417 NEWPERFCOUNTER(_sync_MonScavenged) ; | |
| 418 NEWPERFVARIABLE(_sync_MonExtant) ; | |
| 419 #undef NEWPERFCOUNTER | |
| 420 } | |
| 421 } | |
| 422 | |
| 423 // Compile-time asserts | |
| 424 // When possible, it's better to catch errors deterministically at | |
| 425 // compile-time than at runtime. The down-side to using compile-time | |
| 426 // asserts is that error message -- often something about negative array | |
| 427 // indices -- is opaque. | |
| 428 | |
|
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429 #define CTASSERT(x) { int tag[1-(2*!(x))]; printf ("Tag @" INTPTR_FORMAT "\n", (intptr_t)tag); } |
| 0 | 430 |
| 431 void ObjectMonitor::ctAsserts() { | |
| 432 CTASSERT(offset_of (ObjectMonitor, _header) == 0); | |
| 433 } | |
| 434 | |
| 435 static int Adjust (volatile int * adr, int dx) { | |
| 436 int v ; | |
| 437 for (v = *adr ; Atomic::cmpxchg (v + dx, adr, v) != v; v = *adr) ; | |
| 438 return v ; | |
| 439 } | |
| 440 | |
| 441 // Ad-hoc mutual exclusion primitives: SpinLock and Mux | |
| 442 // | |
| 443 // We employ SpinLocks _only for low-contention, fixed-length | |
| 444 // short-duration critical sections where we're concerned | |
| 445 // about native mutex_t or HotSpot Mutex:: latency. | |
| 446 // The mux construct provides a spin-then-block mutual exclusion | |
| 447 // mechanism. | |
| 448 // | |
| 449 // Testing has shown that contention on the ListLock guarding gFreeList | |
| 450 // is common. If we implement ListLock as a simple SpinLock it's common | |
| 451 // for the JVM to devolve to yielding with little progress. This is true | |
| 452 // despite the fact that the critical sections protected by ListLock are | |
| 453 // extremely short. | |
| 454 // | |
| 455 // TODO-FIXME: ListLock should be of type SpinLock. | |
| 456 // We should make this a 1st-class type, integrated into the lock | |
| 457 // hierarchy as leaf-locks. Critically, the SpinLock structure | |
| 458 // should have sufficient padding to avoid false-sharing and excessive | |
| 459 // cache-coherency traffic. | |
| 460 | |
| 461 | |
| 462 typedef volatile int SpinLockT ; | |
| 463 | |
| 464 void Thread::SpinAcquire (volatile int * adr, const char * LockName) { | |
| 465 if (Atomic::cmpxchg (1, adr, 0) == 0) { | |
| 466 return ; // normal fast-path return | |
| 467 } | |
| 468 | |
| 469 // Slow-path : We've encountered contention -- Spin/Yield/Block strategy. | |
| 470 TEVENT (SpinAcquire - ctx) ; | |
| 471 int ctr = 0 ; | |
| 472 int Yields = 0 ; | |
| 473 for (;;) { | |
| 474 while (*adr != 0) { | |
| 475 ++ctr ; | |
| 476 if ((ctr & 0xFFF) == 0 || !os::is_MP()) { | |
| 477 if (Yields > 5) { | |
| 478 // Consider using a simple NakedSleep() instead. | |
| 479 // Then SpinAcquire could be called by non-JVM threads | |
| 480 Thread::current()->_ParkEvent->park(1) ; | |
| 481 } else { | |
| 482 os::NakedYield() ; | |
| 483 ++Yields ; | |
| 484 } | |
| 485 } else { | |
| 486 SpinPause() ; | |
| 487 } | |
| 488 } | |
| 489 if (Atomic::cmpxchg (1, adr, 0) == 0) return ; | |
| 490 } | |
| 491 } | |
| 492 | |
| 493 void Thread::SpinRelease (volatile int * adr) { | |
| 494 assert (*adr != 0, "invariant") ; | |
| 495 OrderAccess::fence() ; // guarantee at least release consistency. | |
| 496 // Roach-motel semantics. | |
| 497 // It's safe if subsequent LDs and STs float "up" into the critical section, | |
| 498 // but prior LDs and STs within the critical section can't be allowed | |
| 499 // to reorder or float past the ST that releases the lock. | |
| 500 *adr = 0 ; | |
| 501 } | |
| 502 | |
| 503 // muxAcquire and muxRelease: | |
| 504 // | |
| 505 // * muxAcquire and muxRelease support a single-word lock-word construct. | |
| 506 // The LSB of the word is set IFF the lock is held. | |
| 507 // The remainder of the word points to the head of a singly-linked list | |
| 508 // of threads blocked on the lock. | |
| 509 // | |
| 510 // * The current implementation of muxAcquire-muxRelease uses its own | |
| 511 // dedicated Thread._MuxEvent instance. If we're interested in | |
| 512 // minimizing the peak number of extant ParkEvent instances then | |
| 513 // we could eliminate _MuxEvent and "borrow" _ParkEvent as long | |
| 514 // as certain invariants were satisfied. Specifically, care would need | |
| 515 // to be taken with regards to consuming unpark() "permits". | |
| 516 // A safe rule of thumb is that a thread would never call muxAcquire() | |
| 517 // if it's enqueued (cxq, EntryList, WaitList, etc) and will subsequently | |
| 518 // park(). Otherwise the _ParkEvent park() operation in muxAcquire() could | |
| 519 // consume an unpark() permit intended for monitorenter, for instance. | |
| 520 // One way around this would be to widen the restricted-range semaphore | |
| 521 // implemented in park(). Another alternative would be to provide | |
| 522 // multiple instances of the PlatformEvent() for each thread. One | |
| 523 // instance would be dedicated to muxAcquire-muxRelease, for instance. | |
| 524 // | |
| 525 // * Usage: | |
| 526 // -- Only as leaf locks | |
| 527 // -- for short-term locking only as muxAcquire does not perform | |
| 528 // thread state transitions. | |
| 529 // | |
| 530 // Alternatives: | |
| 531 // * We could implement muxAcquire and muxRelease with MCS or CLH locks | |
| 532 // but with parking or spin-then-park instead of pure spinning. | |
| 533 // * Use Taura-Oyama-Yonenzawa locks. | |
| 534 // * It's possible to construct a 1-0 lock if we encode the lockword as | |
| 535 // (List,LockByte). Acquire will CAS the full lockword while Release | |
| 536 // will STB 0 into the LockByte. The 1-0 scheme admits stranding, so | |
| 537 // acquiring threads use timers (ParkTimed) to detect and recover from | |
| 538 // the stranding window. Thread/Node structures must be aligned on 256-byte | |
| 539 // boundaries by using placement-new. | |
| 540 // * Augment MCS with advisory back-link fields maintained with CAS(). | |
| 541 // Pictorially: LockWord -> T1 <-> T2 <-> T3 <-> ... <-> Tn <-> Owner. | |
| 542 // The validity of the backlinks must be ratified before we trust the value. | |
| 543 // If the backlinks are invalid the exiting thread must back-track through the | |
| 544 // the forward links, which are always trustworthy. | |
| 545 // * Add a successor indication. The LockWord is currently encoded as | |
| 546 // (List, LOCKBIT:1). We could also add a SUCCBIT or an explicit _succ variable | |
| 547 // to provide the usual futile-wakeup optimization. | |
| 548 // See RTStt for details. | |
| 549 // * Consider schedctl.sc_nopreempt to cover the critical section. | |
| 550 // | |
| 551 | |
| 552 | |
| 553 typedef volatile intptr_t MutexT ; // Mux Lock-word | |
| 554 enum MuxBits { LOCKBIT = 1 } ; | |
| 555 | |
| 556 void Thread::muxAcquire (volatile intptr_t * Lock, const char * LockName) { | |
| 557 intptr_t w = Atomic::cmpxchg_ptr (LOCKBIT, Lock, 0) ; | |
| 558 if (w == 0) return ; | |
| 559 if ((w & LOCKBIT) == 0 && Atomic::cmpxchg_ptr (w|LOCKBIT, Lock, w) == w) { | |
| 560 return ; | |
| 561 } | |
| 562 | |
| 563 TEVENT (muxAcquire - Contention) ; | |
| 564 ParkEvent * const Self = Thread::current()->_MuxEvent ; | |
| 565 assert ((intptr_t(Self) & LOCKBIT) == 0, "invariant") ; | |
| 566 for (;;) { | |
| 567 int its = (os::is_MP() ? 100 : 0) + 1 ; | |
| 568 | |
| 569 // Optional spin phase: spin-then-park strategy | |
| 570 while (--its >= 0) { | |
| 571 w = *Lock ; | |
| 572 if ((w & LOCKBIT) == 0 && Atomic::cmpxchg_ptr (w|LOCKBIT, Lock, w) == w) { | |
| 573 return ; | |
| 574 } | |
| 575 } | |
| 576 | |
| 577 Self->reset() ; | |
| 578 Self->OnList = intptr_t(Lock) ; | |
| 579 // The following fence() isn't _strictly necessary as the subsequent | |
| 580 // CAS() both serializes execution and ratifies the fetched *Lock value. | |
| 581 OrderAccess::fence(); | |
| 582 for (;;) { | |
| 583 w = *Lock ; | |
| 584 if ((w & LOCKBIT) == 0) { | |
| 585 if (Atomic::cmpxchg_ptr (w|LOCKBIT, Lock, w) == w) { | |
| 586 Self->OnList = 0 ; // hygiene - allows stronger asserts | |
| 587 return ; | |
| 588 } | |
| 589 continue ; // Interference -- *Lock changed -- Just retry | |
| 590 } | |
| 591 assert (w & LOCKBIT, "invariant") ; | |
| 592 Self->ListNext = (ParkEvent *) (w & ~LOCKBIT ); | |
| 593 if (Atomic::cmpxchg_ptr (intptr_t(Self)|LOCKBIT, Lock, w) == w) break ; | |
| 594 } | |
| 595 | |
| 596 while (Self->OnList != 0) { | |
| 597 Self->park() ; | |
| 598 } | |
| 599 } | |
| 600 } | |
| 601 | |
| 602 void Thread::muxAcquireW (volatile intptr_t * Lock, ParkEvent * ev) { | |
| 603 intptr_t w = Atomic::cmpxchg_ptr (LOCKBIT, Lock, 0) ; | |
| 604 if (w == 0) return ; | |
| 605 if ((w & LOCKBIT) == 0 && Atomic::cmpxchg_ptr (w|LOCKBIT, Lock, w) == w) { | |
| 606 return ; | |
| 607 } | |
| 608 | |
| 609 TEVENT (muxAcquire - Contention) ; | |
| 610 ParkEvent * ReleaseAfter = NULL ; | |
| 611 if (ev == NULL) { | |
| 612 ev = ReleaseAfter = ParkEvent::Allocate (NULL) ; | |
| 613 } | |
| 614 assert ((intptr_t(ev) & LOCKBIT) == 0, "invariant") ; | |
| 615 for (;;) { | |
| 616 guarantee (ev->OnList == 0, "invariant") ; | |
| 617 int its = (os::is_MP() ? 100 : 0) + 1 ; | |
| 618 | |
| 619 // Optional spin phase: spin-then-park strategy | |
| 620 while (--its >= 0) { | |
| 621 w = *Lock ; | |
| 622 if ((w & LOCKBIT) == 0 && Atomic::cmpxchg_ptr (w|LOCKBIT, Lock, w) == w) { | |
| 623 if (ReleaseAfter != NULL) { | |
| 624 ParkEvent::Release (ReleaseAfter) ; | |
| 625 } | |
| 626 return ; | |
| 627 } | |
| 628 } | |
| 629 | |
| 630 ev->reset() ; | |
| 631 ev->OnList = intptr_t(Lock) ; | |
| 632 // The following fence() isn't _strictly necessary as the subsequent | |
| 633 // CAS() both serializes execution and ratifies the fetched *Lock value. | |
| 634 OrderAccess::fence(); | |
| 635 for (;;) { | |
| 636 w = *Lock ; | |
| 637 if ((w & LOCKBIT) == 0) { | |
| 638 if (Atomic::cmpxchg_ptr (w|LOCKBIT, Lock, w) == w) { | |
| 639 ev->OnList = 0 ; | |
| 640 // We call ::Release while holding the outer lock, thus | |
| 641 // artificially lengthening the critical section. | |
| 642 // Consider deferring the ::Release() until the subsequent unlock(), | |
| 643 // after we've dropped the outer lock. | |
| 644 if (ReleaseAfter != NULL) { | |
| 645 ParkEvent::Release (ReleaseAfter) ; | |
| 646 } | |
| 647 return ; | |
| 648 } | |
| 649 continue ; // Interference -- *Lock changed -- Just retry | |
| 650 } | |
| 651 assert (w & LOCKBIT, "invariant") ; | |
| 652 ev->ListNext = (ParkEvent *) (w & ~LOCKBIT ); | |
| 653 if (Atomic::cmpxchg_ptr (intptr_t(ev)|LOCKBIT, Lock, w) == w) break ; | |
| 654 } | |
| 655 | |
| 656 while (ev->OnList != 0) { | |
| 657 ev->park() ; | |
| 658 } | |
| 659 } | |
| 660 } | |
| 661 | |
| 662 // Release() must extract a successor from the list and then wake that thread. | |
| 663 // It can "pop" the front of the list or use a detach-modify-reattach (DMR) scheme | |
| 664 // similar to that used by ParkEvent::Allocate() and ::Release(). DMR-based | |
| 665 // Release() would : | |
| 666 // (A) CAS() or swap() null to *Lock, releasing the lock and detaching the list. | |
| 667 // (B) Extract a successor from the private list "in-hand" | |
| 668 // (C) attempt to CAS() the residual back into *Lock over null. | |
| 669 // If there were any newly arrived threads and the CAS() would fail. | |
| 670 // In that case Release() would detach the RATs, re-merge the list in-hand | |
| 671 // with the RATs and repeat as needed. Alternately, Release() might | |
| 672 // detach and extract a successor, but then pass the residual list to the wakee. | |
| 673 // The wakee would be responsible for reattaching and remerging before it | |
| 674 // competed for the lock. | |
| 675 // | |
| 676 // Both "pop" and DMR are immune from ABA corruption -- there can be | |
| 677 // multiple concurrent pushers, but only one popper or detacher. | |
| 678 // This implementation pops from the head of the list. This is unfair, | |
| 679 // but tends to provide excellent throughput as hot threads remain hot. | |
| 680 // (We wake recently run threads first). | |
| 681 | |
| 682 void Thread::muxRelease (volatile intptr_t * Lock) { | |
| 683 for (;;) { | |
| 684 const intptr_t w = Atomic::cmpxchg_ptr (0, Lock, LOCKBIT) ; | |
| 685 assert (w & LOCKBIT, "invariant") ; | |
| 686 if (w == LOCKBIT) return ; | |
| 687 ParkEvent * List = (ParkEvent *) (w & ~LOCKBIT) ; | |
| 688 assert (List != NULL, "invariant") ; | |
| 689 assert (List->OnList == intptr_t(Lock), "invariant") ; | |
| 690 ParkEvent * nxt = List->ListNext ; | |
| 691 | |
| 692 // The following CAS() releases the lock and pops the head element. | |
| 693 if (Atomic::cmpxchg_ptr (intptr_t(nxt), Lock, w) != w) { | |
| 694 continue ; | |
| 695 } | |
| 696 List->OnList = 0 ; | |
| 697 OrderAccess::fence() ; | |
| 698 List->unpark () ; | |
| 699 return ; | |
| 700 } | |
| 701 } | |
| 702 | |
| 703 // ObjectMonitor Lifecycle | |
| 704 // ----------------------- | |
| 705 // Inflation unlinks monitors from the global gFreeList and | |
| 706 // associates them with objects. Deflation -- which occurs at | |
| 707 // STW-time -- disassociates idle monitors from objects. Such | |
| 708 // scavenged monitors are returned to the gFreeList. | |
| 709 // | |
| 710 // The global list is protected by ListLock. All the critical sections | |
| 711 // are short and operate in constant-time. | |
| 712 // | |
| 713 // ObjectMonitors reside in type-stable memory (TSM) and are immortal. | |
| 714 // | |
| 715 // Lifecycle: | |
| 716 // -- unassigned and on the global free list | |
| 717 // -- unassigned and on a thread's private omFreeList | |
| 718 // -- assigned to an object. The object is inflated and the mark refers | |
| 719 // to the objectmonitor. | |
| 720 // | |
| 721 // TODO-FIXME: | |
| 722 // | |
| 723 // * We currently protect the gFreeList with a simple lock. | |
| 724 // An alternate lock-free scheme would be to pop elements from the gFreeList | |
| 725 // with CAS. This would be safe from ABA corruption as long we only | |
| 726 // recycled previously appearing elements onto the list in deflate_idle_monitors() | |
| 727 // at STW-time. Completely new elements could always be pushed onto the gFreeList | |
| 728 // with CAS. Elements that appeared previously on the list could only | |
| 729 // be installed at STW-time. | |
| 730 // | |
| 731 // * For efficiency and to help reduce the store-before-CAS penalty | |
| 732 // the objectmonitors on gFreeList or local free lists should be ready to install | |
| 733 // with the exception of _header and _object. _object can be set after inflation. | |
| 734 // In particular, keep all objectMonitors on a thread's private list in ready-to-install | |
| 735 // state with m.Owner set properly. | |
| 736 // | |
| 737 // * We could all diffuse contention by using multiple global (FreeList, Lock) | |
| 738 // pairs -- threads could use trylock() and a cyclic-scan strategy to search for | |
| 739 // an unlocked free list. | |
| 740 // | |
| 741 // * Add lifecycle tags and assert()s. | |
| 742 // | |
| 743 // * Be more consistent about when we clear an objectmonitor's fields: | |
| 744 // A. After extracting the objectmonitor from a free list. | |
| 745 // B. After adding an objectmonitor to a free list. | |
| 746 // | |
| 747 | |
| 748 ObjectMonitor * ObjectSynchronizer::gBlockList = NULL ; | |
| 749 ObjectMonitor * volatile ObjectSynchronizer::gFreeList = NULL ; | |
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750 ObjectMonitor * volatile ObjectSynchronizer::gOmInUseList = NULL ; |
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751 int ObjectSynchronizer::gOmInUseCount = 0; |
| 0 | 752 static volatile intptr_t ListLock = 0 ; // protects global monitor free-list cache |
| 1587 | 753 static volatile int MonitorFreeCount = 0 ; // # on gFreeList |
| 754 static volatile int MonitorPopulation = 0 ; // # Extant -- in circulation | |
| 0 | 755 #define CHAINMARKER ((oop)-1) |
| 756 | |
| 1587 | 757 // Constraining monitor pool growth via MonitorBound ... |
| 758 // | |
| 759 // The monitor pool is grow-only. We scavenge at STW safepoint-time, but the | |
| 760 // the rate of scavenging is driven primarily by GC. As such, we can find | |
| 761 // an inordinate number of monitors in circulation. | |
| 762 // To avoid that scenario we can artificially induce a STW safepoint | |
| 763 // if the pool appears to be growing past some reasonable bound. | |
| 764 // Generally we favor time in space-time tradeoffs, but as there's no | |
| 765 // natural back-pressure on the # of extant monitors we need to impose some | |
| 766 // type of limit. Beware that if MonitorBound is set to too low a value | |
| 767 // we could just loop. In addition, if MonitorBound is set to a low value | |
| 768 // we'll incur more safepoints, which are harmful to performance. | |
| 769 // See also: GuaranteedSafepointInterval | |
| 770 // | |
| 771 // As noted elsewhere, the correct long-term solution is to deflate at | |
| 772 // monitorexit-time, in which case the number of inflated objects is bounded | |
| 773 // by the number of threads. That policy obviates the need for scavenging at | |
| 774 // STW safepoint time. As an aside, scavenging can be time-consuming when the | |
| 775 // # of extant monitors is large. Unfortunately there's a day-1 assumption baked | |
| 776 // into much HotSpot code that the object::monitor relationship, once established | |
| 777 // or observed, will remain stable except over potential safepoints. | |
| 778 // | |
| 779 // We can use either a blocking synchronous VM operation or an async VM operation. | |
| 780 // -- If we use a blocking VM operation : | |
| 781 // Calls to ScavengeCheck() should be inserted only into 'safe' locations in paths | |
| 782 // that lead to ::inflate() or ::omAlloc(). | |
| 783 // Even though the safepoint will not directly induce GC, a GC might | |
| 784 // piggyback on the safepoint operation, so the caller should hold no naked oops. | |
| 785 // Furthermore, monitor::object relationships are NOT necessarily stable over this call | |
| 786 // unless the caller has made provisions to "pin" the object to the monitor, say | |
| 787 // by incrementing the monitor's _count field. | |
| 788 // -- If we use a non-blocking asynchronous VM operation : | |
| 789 // the constraints above don't apply. The safepoint will fire in the future | |
| 790 // at a more convenient time. On the other hand the latency between posting and | |
| 791 // running the safepoint introduces or admits "slop" or laxity during which the | |
| 792 // monitor population can climb further above the threshold. The monitor population, | |
| 793 // however, tends to converge asymptotically over time to a count that's slightly | |
| 794 // above the target value specified by MonitorBound. That is, we avoid unbounded | |
| 795 // growth, albeit with some imprecision. | |
| 796 // | |
| 797 // The current implementation uses asynchronous VM operations. | |
| 798 // | |
| 799 // Ideally we'd check if (MonitorPopulation > MonitorBound) in omAlloc() | |
| 800 // immediately before trying to grow the global list via allocation. | |
| 801 // If the predicate was true then we'd induce a synchronous safepoint, wait | |
| 802 // for the safepoint to complete, and then again to allocate from the global | |
| 803 // free list. This approach is much simpler and precise, admitting no "slop". | |
| 804 // Unfortunately we can't safely safepoint in the midst of omAlloc(), so | |
| 805 // instead we use asynchronous safepoints. | |
| 806 | |
| 807 static void InduceScavenge (Thread * Self, const char * Whence) { | |
| 808 // Induce STW safepoint to trim monitors | |
| 809 // Ultimately, this results in a call to deflate_idle_monitors() in the near future. | |
| 810 // More precisely, trigger an asynchronous STW safepoint as the number | |
| 811 // of active monitors passes the specified threshold. | |
| 812 // TODO: assert thread state is reasonable | |
| 813 | |
| 814 if (ForceMonitorScavenge == 0 && Atomic::xchg (1, &ForceMonitorScavenge) == 0) { | |
| 815 if (Knob_Verbose) { | |
| 816 ::printf ("Monitor scavenge - Induced STW @%s (%d)\n", Whence, ForceMonitorScavenge) ; | |
| 817 ::fflush(stdout) ; | |
| 818 } | |
| 819 // Induce a 'null' safepoint to scavenge monitors | |
| 820 // Must VM_Operation instance be heap allocated as the op will be enqueue and posted | |
| 821 // to the VMthread and have a lifespan longer than that of this activation record. | |
| 822 // The VMThread will delete the op when completed. | |
| 823 VMThread::execute (new VM_ForceAsyncSafepoint()) ; | |
| 824 | |
| 825 if (Knob_Verbose) { | |
| 826 ::printf ("Monitor scavenge - STW posted @%s (%d)\n", Whence, ForceMonitorScavenge) ; | |
| 827 ::fflush(stdout) ; | |
| 828 } | |
| 829 } | |
| 830 } | |
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831 /* Too slow for general assert or debug |
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832 void ObjectSynchronizer::verifyInUse (Thread *Self) { |
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833 ObjectMonitor* mid; |
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834 int inusetally = 0; |
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835 for (mid = Self->omInUseList; mid != NULL; mid = mid->FreeNext) { |
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836 inusetally ++; |
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837 } |
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838 assert(inusetally == Self->omInUseCount, "inuse count off"); |
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839 |
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840 int freetally = 0; |
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841 for (mid = Self->omFreeList; mid != NULL; mid = mid->FreeNext) { |
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842 freetally ++; |
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843 } |
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844 assert(freetally == Self->omFreeCount, "free count off"); |
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845 } |
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846 */ |
| 1587 | 847 |
| 0 | 848 ObjectMonitor * ATTR ObjectSynchronizer::omAlloc (Thread * Self) { |
| 849 // A large MAXPRIVATE value reduces both list lock contention | |
| 850 // and list coherency traffic, but also tends to increase the | |
| 851 // number of objectMonitors in circulation as well as the STW | |
| 852 // scavenge costs. As usual, we lean toward time in space-time | |
| 853 // tradeoffs. | |
| 854 const int MAXPRIVATE = 1024 ; | |
| 855 for (;;) { | |
| 856 ObjectMonitor * m ; | |
| 857 | |
| 858 // 1: try to allocate from the thread's local omFreeList. | |
| 859 // Threads will attempt to allocate first from their local list, then | |
| 860 // from the global list, and only after those attempts fail will the thread | |
| 861 // attempt to instantiate new monitors. Thread-local free lists take | |
| 862 // heat off the ListLock and improve allocation latency, as well as reducing | |
| 863 // coherency traffic on the shared global list. | |
| 864 m = Self->omFreeList ; | |
| 865 if (m != NULL) { | |
| 866 Self->omFreeList = m->FreeNext ; | |
| 867 Self->omFreeCount -- ; | |
| 868 // CONSIDER: set m->FreeNext = BAD -- diagnostic hygiene | |
| 869 guarantee (m->object() == NULL, "invariant") ; | |
| 1587 | 870 if (MonitorInUseLists) { |
| 871 m->FreeNext = Self->omInUseList; | |
| 872 Self->omInUseList = m; | |
| 873 Self->omInUseCount ++; | |
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874 // verifyInUse(Self); |
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875 } else { |
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876 m->FreeNext = NULL; |
| 1587 | 877 } |
| 0 | 878 return m ; |
| 879 } | |
| 880 | |
| 881 // 2: try to allocate from the global gFreeList | |
| 882 // CONSIDER: use muxTry() instead of muxAcquire(). | |
| 883 // If the muxTry() fails then drop immediately into case 3. | |
| 884 // If we're using thread-local free lists then try | |
| 885 // to reprovision the caller's free list. | |
| 886 if (gFreeList != NULL) { | |
| 887 // Reprovision the thread's omFreeList. | |
| 888 // Use bulk transfers to reduce the allocation rate and heat | |
| 889 // on various locks. | |
| 890 Thread::muxAcquire (&ListLock, "omAlloc") ; | |
| 891 for (int i = Self->omFreeProvision; --i >= 0 && gFreeList != NULL; ) { | |
| 1587 | 892 MonitorFreeCount --; |
| 0 | 893 ObjectMonitor * take = gFreeList ; |
| 894 gFreeList = take->FreeNext ; | |
| 895 guarantee (take->object() == NULL, "invariant") ; | |
| 896 guarantee (!take->is_busy(), "invariant") ; | |
| 897 take->Recycle() ; | |
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898 omRelease (Self, take, false) ; |
| 0 | 899 } |
| 900 Thread::muxRelease (&ListLock) ; | |
| 901 Self->omFreeProvision += 1 + (Self->omFreeProvision/2) ; | |
| 902 if (Self->omFreeProvision > MAXPRIVATE ) Self->omFreeProvision = MAXPRIVATE ; | |
| 903 TEVENT (omFirst - reprovision) ; | |
| 1587 | 904 |
| 905 const int mx = MonitorBound ; | |
| 906 if (mx > 0 && (MonitorPopulation-MonitorFreeCount) > mx) { | |
| 907 // We can't safely induce a STW safepoint from omAlloc() as our thread | |
| 908 // state may not be appropriate for such activities and callers may hold | |
| 909 // naked oops, so instead we defer the action. | |
| 910 InduceScavenge (Self, "omAlloc") ; | |
| 911 } | |
| 912 continue; | |
| 0 | 913 } |
| 914 | |
| 915 // 3: allocate a block of new ObjectMonitors | |
| 916 // Both the local and global free lists are empty -- resort to malloc(). | |
| 917 // In the current implementation objectMonitors are TSM - immortal. | |
| 918 assert (_BLOCKSIZE > 1, "invariant") ; | |
| 919 ObjectMonitor * temp = new ObjectMonitor[_BLOCKSIZE]; | |
| 920 | |
| 921 // NOTE: (almost) no way to recover if allocation failed. | |
| 922 // We might be able to induce a STW safepoint and scavenge enough | |
| 923 // objectMonitors to permit progress. | |
| 924 if (temp == NULL) { | |
| 925 vm_exit_out_of_memory (sizeof (ObjectMonitor[_BLOCKSIZE]), "Allocate ObjectMonitors") ; | |
| 926 } | |
| 927 | |
| 928 // Format the block. | |
| 929 // initialize the linked list, each monitor points to its next | |
| 930 // forming the single linked free list, the very first monitor | |
| 931 // will points to next block, which forms the block list. | |
| 932 // The trick of using the 1st element in the block as gBlockList | |
| 933 // linkage should be reconsidered. A better implementation would | |
| 934 // look like: class Block { Block * next; int N; ObjectMonitor Body [N] ; } | |
| 935 | |
| 936 for (int i = 1; i < _BLOCKSIZE ; i++) { | |
| 937 temp[i].FreeNext = &temp[i+1]; | |
| 938 } | |
| 939 | |
| 940 // terminate the last monitor as the end of list | |
| 941 temp[_BLOCKSIZE - 1].FreeNext = NULL ; | |
| 942 | |
| 943 // Element [0] is reserved for global list linkage | |
| 944 temp[0].set_object(CHAINMARKER); | |
| 945 | |
| 946 // Consider carving out this thread's current request from the | |
| 947 // block in hand. This avoids some lock traffic and redundant | |
| 948 // list activity. | |
| 949 | |
| 950 // Acquire the ListLock to manipulate BlockList and FreeList. | |
| 951 // An Oyama-Taura-Yonezawa scheme might be more efficient. | |
| 952 Thread::muxAcquire (&ListLock, "omAlloc [2]") ; | |
| 1587 | 953 MonitorPopulation += _BLOCKSIZE-1; |
| 954 MonitorFreeCount += _BLOCKSIZE-1; | |
| 0 | 955 |
| 956 // Add the new block to the list of extant blocks (gBlockList). | |
| 957 // The very first objectMonitor in a block is reserved and dedicated. | |
| 958 // It serves as blocklist "next" linkage. | |
| 959 temp[0].FreeNext = gBlockList; | |
| 960 gBlockList = temp; | |
| 961 | |
| 962 // Add the new string of objectMonitors to the global free list | |
| 963 temp[_BLOCKSIZE - 1].FreeNext = gFreeList ; | |
| 964 gFreeList = temp + 1; | |
| 965 Thread::muxRelease (&ListLock) ; | |
| 966 TEVENT (Allocate block of monitors) ; | |
| 967 } | |
| 968 } | |
| 969 | |
| 970 // Place "m" on the caller's private per-thread omFreeList. | |
| 971 // In practice there's no need to clamp or limit the number of | |
| 972 // monitors on a thread's omFreeList as the only time we'll call | |
| 973 // omRelease is to return a monitor to the free list after a CAS | |
| 974 // attempt failed. This doesn't allow unbounded #s of monitors to | |
| 975 // accumulate on a thread's free list. | |
| 976 // | |
| 977 // In the future the usage of omRelease() might change and monitors | |
| 978 // could migrate between free lists. In that case to avoid excessive | |
| 979 // accumulation we could limit omCount to (omProvision*2), otherwise return | |
| 980 // the objectMonitor to the global list. We should drain (return) in reasonable chunks. | |
| 981 // That is, *not* one-at-a-time. | |
| 982 | |
| 983 | |
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984 void ObjectSynchronizer::omRelease (Thread * Self, ObjectMonitor * m, bool fromPerThreadAlloc) { |
| 0 | 985 guarantee (m->object() == NULL, "invariant") ; |
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986 |
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987 // Remove from omInUseList |
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988 if (MonitorInUseLists && fromPerThreadAlloc) { |
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989 ObjectMonitor* curmidinuse = NULL; |
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990 for (ObjectMonitor* mid = Self->omInUseList; mid != NULL; ) { |
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991 if (m == mid) { |
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992 // extract from per-thread in-use-list |
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993 if (mid == Self->omInUseList) { |
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994 Self->omInUseList = mid->FreeNext; |
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995 } else if (curmidinuse != NULL) { |
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996 curmidinuse->FreeNext = mid->FreeNext; // maintain the current thread inuselist |
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997 } |
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998 Self->omInUseCount --; |
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999 // verifyInUse(Self); |
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1000 break; |
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1001 } else { |
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1002 curmidinuse = mid; |
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1003 mid = mid->FreeNext; |
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1004 } |
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1005 } |
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1006 } |
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1007 |
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1008 // FreeNext is used for both onInUseList and omFreeList, so clear old before setting new |
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1009 m->FreeNext = Self->omFreeList ; |
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1010 Self->omFreeList = m ; |
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1011 Self->omFreeCount ++ ; |
| 0 | 1012 } |
| 1013 | |
| 1014 // Return the monitors of a moribund thread's local free list to | |
| 1015 // the global free list. Typically a thread calls omFlush() when | |
| 1016 // it's dying. We could also consider having the VM thread steal | |
| 1017 // monitors from threads that have not run java code over a few | |
| 1018 // consecutive STW safepoints. Relatedly, we might decay | |
| 1019 // omFreeProvision at STW safepoints. | |
| 1020 // | |
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1021 // Also return the monitors of a moribund thread"s omInUseList to |
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1022 // a global gOmInUseList under the global list lock so these |
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1023 // will continue to be scanned. |
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1024 // |
| 0 | 1025 // We currently call omFlush() from the Thread:: dtor _after the thread |
| 1026 // has been excised from the thread list and is no longer a mutator. | |
| 1027 // That means that omFlush() can run concurrently with a safepoint and | |
| 1028 // the scavenge operator. Calling omFlush() from JavaThread::exit() might | |
| 1029 // be a better choice as we could safely reason that that the JVM is | |
| 1030 // not at a safepoint at the time of the call, and thus there could | |
| 1031 // be not inopportune interleavings between omFlush() and the scavenge | |
| 1032 // operator. | |
| 1033 | |
| 1034 void ObjectSynchronizer::omFlush (Thread * Self) { | |
| 1035 ObjectMonitor * List = Self->omFreeList ; // Null-terminated SLL | |
| 1036 Self->omFreeList = NULL ; | |
| 1037 ObjectMonitor * Tail = NULL ; | |
| 1587 | 1038 int Tally = 0; |
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1039 if (List != NULL) { |
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1040 ObjectMonitor * s ; |
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1041 for (s = List ; s != NULL ; s = s->FreeNext) { |
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1042 Tally ++ ; |
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1043 Tail = s ; |
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1044 guarantee (s->object() == NULL, "invariant") ; |
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1045 guarantee (!s->is_busy(), "invariant") ; |
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1046 s->set_owner (NULL) ; // redundant but good hygiene |
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1047 TEVENT (omFlush - Move one) ; |
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1048 } |
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1049 guarantee (Tail != NULL && List != NULL, "invariant") ; |
| 0 | 1050 } |
| 1051 | |
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1052 ObjectMonitor * InUseList = Self->omInUseList; |
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1053 ObjectMonitor * InUseTail = NULL ; |
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1054 int InUseTally = 0; |
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1055 if (InUseList != NULL) { |
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1056 Self->omInUseList = NULL; |
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1057 ObjectMonitor *curom; |
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1058 for (curom = InUseList; curom != NULL; curom = curom->FreeNext) { |
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1059 InUseTail = curom; |
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1060 InUseTally++; |
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1061 } |
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1062 // TODO debug |
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1063 assert(Self->omInUseCount == InUseTally, "inuse count off"); |
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1064 Self->omInUseCount = 0; |
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1065 guarantee (InUseTail != NULL && InUseList != NULL, "invariant"); |
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1066 } |
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1067 |
| 0 | 1068 Thread::muxAcquire (&ListLock, "omFlush") ; |
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1069 if (Tail != NULL) { |
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1070 Tail->FreeNext = gFreeList ; |
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1071 gFreeList = List ; |
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1072 MonitorFreeCount += Tally; |
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1073 } |
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1074 |
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1075 if (InUseTail != NULL) { |
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1076 InUseTail->FreeNext = gOmInUseList; |
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1077 gOmInUseList = InUseList; |
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1078 gOmInUseCount += InUseTally; |
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1079 } |
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1080 |
| 0 | 1081 Thread::muxRelease (&ListLock) ; |
| 1082 TEVENT (omFlush) ; | |
| 1083 } | |
| 1084 | |
| 1085 | |
| 1086 // Get the next block in the block list. | |
| 1087 static inline ObjectMonitor* next(ObjectMonitor* block) { | |
| 1088 assert(block->object() == CHAINMARKER, "must be a block header"); | |
| 1089 block = block->FreeNext ; | |
| 1090 assert(block == NULL || block->object() == CHAINMARKER, "must be a block header"); | |
| 1091 return block; | |
| 1092 } | |
| 1093 | |
| 1094 // Fast path code shared by multiple functions | |
| 1095 ObjectMonitor* ObjectSynchronizer::inflate_helper(oop obj) { | |
| 1096 markOop mark = obj->mark(); | |
| 1097 if (mark->has_monitor()) { | |
| 1098 assert(ObjectSynchronizer::verify_objmon_isinpool(mark->monitor()), "monitor is invalid"); | |
| 1099 assert(mark->monitor()->header()->is_neutral(), "monitor must record a good object header"); | |
| 1100 return mark->monitor(); | |
| 1101 } | |
| 1102 return ObjectSynchronizer::inflate(Thread::current(), obj); | |
| 1103 } | |
| 1104 | |
| 1105 // Note that we could encounter some performance loss through false-sharing as | |
| 1106 // multiple locks occupy the same $ line. Padding might be appropriate. | |
| 1107 | |
| 1108 #define NINFLATIONLOCKS 256 | |
| 1109 static volatile intptr_t InflationLocks [NINFLATIONLOCKS] ; | |
| 1110 | |
| 1111 static markOop ReadStableMark (oop obj) { | |
| 1112 markOop mark = obj->mark() ; | |
| 1113 if (!mark->is_being_inflated()) { | |
| 1114 return mark ; // normal fast-path return | |
| 1115 } | |
| 1116 | |
| 1117 int its = 0 ; | |
| 1118 for (;;) { | |
| 1119 markOop mark = obj->mark() ; | |
| 1120 if (!mark->is_being_inflated()) { | |
| 1121 return mark ; // normal fast-path return | |
| 1122 } | |
| 1123 | |
| 1124 // The object is being inflated by some other thread. | |
| 1125 // The caller of ReadStableMark() must wait for inflation to complete. | |
| 1126 // Avoid live-lock | |
| 1127 // TODO: consider calling SafepointSynchronize::do_call_back() while | |
| 1128 // spinning to see if there's a safepoint pending. If so, immediately | |
| 1129 // yielding or blocking would be appropriate. Avoid spinning while | |
| 1130 // there is a safepoint pending. | |
| 1131 // TODO: add inflation contention performance counters. | |
| 1132 // TODO: restrict the aggregate number of spinners. | |
| 1133 | |
| 1134 ++its ; | |
| 1135 if (its > 10000 || !os::is_MP()) { | |
| 1136 if (its & 1) { | |
| 1137 os::NakedYield() ; | |
| 1138 TEVENT (Inflate: INFLATING - yield) ; | |
| 1139 } else { | |
| 1140 // Note that the following code attenuates the livelock problem but is not | |
| 1141 // a complete remedy. A more complete solution would require that the inflating | |
| 1142 // thread hold the associated inflation lock. The following code simply restricts | |
| 1143 // the number of spinners to at most one. We'll have N-2 threads blocked | |
| 1144 // on the inflationlock, 1 thread holding the inflation lock and using | |
| 1145 // a yield/park strategy, and 1 thread in the midst of inflation. | |
| 1146 // A more refined approach would be to change the encoding of INFLATING | |
| 1147 // to allow encapsulation of a native thread pointer. Threads waiting for | |
| 1148 // inflation to complete would use CAS to push themselves onto a singly linked | |
| 1149 // list rooted at the markword. Once enqueued, they'd loop, checking a per-thread flag | |
| 1150 // and calling park(). When inflation was complete the thread that accomplished inflation | |
| 1151 // would detach the list and set the markword to inflated with a single CAS and | |
| 1152 // then for each thread on the list, set the flag and unpark() the thread. | |
| 1153 // This is conceptually similar to muxAcquire-muxRelease, except that muxRelease | |
| 1154 // wakes at most one thread whereas we need to wake the entire list. | |
| 1155 int ix = (intptr_t(obj) >> 5) & (NINFLATIONLOCKS-1) ; | |
| 1156 int YieldThenBlock = 0 ; | |
| 1157 assert (ix >= 0 && ix < NINFLATIONLOCKS, "invariant") ; | |
| 1158 assert ((NINFLATIONLOCKS & (NINFLATIONLOCKS-1)) == 0, "invariant") ; | |
| 1159 Thread::muxAcquire (InflationLocks + ix, "InflationLock") ; | |
| 1160 while (obj->mark() == markOopDesc::INFLATING()) { | |
| 1161 // Beware: NakedYield() is advisory and has almost no effect on some platforms | |
| 1162 // so we periodically call Self->_ParkEvent->park(1). | |
| 1163 // We use a mixed spin/yield/block mechanism. | |
| 1164 if ((YieldThenBlock++) >= 16) { | |
| 1165 Thread::current()->_ParkEvent->park(1) ; | |
| 1166 } else { | |
| 1167 os::NakedYield() ; | |
| 1168 } | |
| 1169 } | |
| 1170 Thread::muxRelease (InflationLocks + ix ) ; | |
| 1171 TEVENT (Inflate: INFLATING - yield/park) ; | |
| 1172 } | |
| 1173 } else { | |
| 1174 SpinPause() ; // SMP-polite spinning | |
| 1175 } | |
| 1176 } | |
| 1177 } | |
| 1178 | |
| 1179 ObjectMonitor * ATTR ObjectSynchronizer::inflate (Thread * Self, oop object) { | |
| 1180 // Inflate mutates the heap ... | |
| 1181 // Relaxing assertion for bug 6320749. | |
| 1182 assert (Universe::verify_in_progress() || | |
| 1183 !SafepointSynchronize::is_at_safepoint(), "invariant") ; | |
| 1184 | |
| 1185 for (;;) { | |
| 1186 const markOop mark = object->mark() ; | |
| 1187 assert (!mark->has_bias_pattern(), "invariant") ; | |
| 1188 | |
| 1189 // The mark can be in one of the following states: | |
| 1190 // * Inflated - just return | |
| 1191 // * Stack-locked - coerce it to inflated | |
| 1192 // * INFLATING - busy wait for conversion to complete | |
| 1193 // * Neutral - aggressively inflate the object. | |
| 1194 // * BIASED - Illegal. We should never see this | |
| 1195 | |
| 1196 // CASE: inflated | |
| 1197 if (mark->has_monitor()) { | |
| 1198 ObjectMonitor * inf = mark->monitor() ; | |
| 1199 assert (inf->header()->is_neutral(), "invariant"); | |
| 1200 assert (inf->object() == object, "invariant") ; | |
| 1201 assert (ObjectSynchronizer::verify_objmon_isinpool(inf), "monitor is invalid"); | |
| 1202 return inf ; | |
| 1203 } | |
| 1204 | |
| 1205 // CASE: inflation in progress - inflating over a stack-lock. | |
| 1206 // Some other thread is converting from stack-locked to inflated. | |
| 1207 // Only that thread can complete inflation -- other threads must wait. | |
| 1208 // The INFLATING value is transient. | |
| 1209 // Currently, we spin/yield/park and poll the markword, waiting for inflation to finish. | |
| 1210 // We could always eliminate polling by parking the thread on some auxiliary list. | |
| 1211 if (mark == markOopDesc::INFLATING()) { | |
| 1212 TEVENT (Inflate: spin while INFLATING) ; | |
| 1213 ReadStableMark(object) ; | |
| 1214 continue ; | |
| 1215 } | |
| 1216 | |
| 1217 // CASE: stack-locked | |
| 1218 // Could be stack-locked either by this thread or by some other thread. | |
| 1219 // | |
| 1220 // Note that we allocate the objectmonitor speculatively, _before_ attempting | |
| 1221 // to install INFLATING into the mark word. We originally installed INFLATING, | |
| 1222 // allocated the objectmonitor, and then finally STed the address of the | |
| 1223 // objectmonitor into the mark. This was correct, but artificially lengthened | |
| 1224 // the interval in which INFLATED appeared in the mark, thus increasing | |
| 1225 // the odds of inflation contention. | |
| 1226 // | |
| 1227 // We now use per-thread private objectmonitor free lists. | |
| 1228 // These list are reprovisioned from the global free list outside the | |
| 1229 // critical INFLATING...ST interval. A thread can transfer | |
| 1230 // multiple objectmonitors en-mass from the global free list to its local free list. | |
| 1231 // This reduces coherency traffic and lock contention on the global free list. | |
| 1232 // Using such local free lists, it doesn't matter if the omAlloc() call appears | |
| 1233 // before or after the CAS(INFLATING) operation. | |
| 1234 // See the comments in omAlloc(). | |
| 1235 | |
| 1236 if (mark->has_locker()) { | |
| 1237 ObjectMonitor * m = omAlloc (Self) ; | |
| 1238 // Optimistically prepare the objectmonitor - anticipate successful CAS | |
| 1239 // We do this before the CAS in order to minimize the length of time | |
| 1240 // in which INFLATING appears in the mark. | |
| 1241 m->Recycle(); | |
| 1242 m->_Responsible = NULL ; | |
| 1243 m->OwnerIsThread = 0 ; | |
| 1244 m->_recursions = 0 ; | |
| 1245 m->_SpinDuration = Knob_SpinLimit ; // Consider: maintain by type/class | |
| 1246 | |
| 1247 markOop cmp = (markOop) Atomic::cmpxchg_ptr (markOopDesc::INFLATING(), object->mark_addr(), mark) ; | |
| 1248 if (cmp != mark) { | |
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1249 omRelease (Self, m, true) ; |
| 0 | 1250 continue ; // Interference -- just retry |
| 1251 } | |
| 1252 | |
| 1253 // We've successfully installed INFLATING (0) into the mark-word. | |
| 1254 // This is the only case where 0 will appear in a mark-work. | |
| 1255 // Only the singular thread that successfully swings the mark-word | |
| 1256 // to 0 can perform (or more precisely, complete) inflation. | |
| 1257 // | |
| 1258 // Why do we CAS a 0 into the mark-word instead of just CASing the | |
| 1259 // mark-word from the stack-locked value directly to the new inflated state? | |
| 1260 // Consider what happens when a thread unlocks a stack-locked object. | |
| 1261 // It attempts to use CAS to swing the displaced header value from the | |
| 1262 // on-stack basiclock back into the object header. Recall also that the | |
| 1263 // header value (hashcode, etc) can reside in (a) the object header, or | |
| 1264 // (b) a displaced header associated with the stack-lock, or (c) a displaced | |
| 1265 // header in an objectMonitor. The inflate() routine must copy the header | |
| 1266 // value from the basiclock on the owner's stack to the objectMonitor, all | |
| 1267 // the while preserving the hashCode stability invariants. If the owner | |
| 1268 // decides to release the lock while the value is 0, the unlock will fail | |
| 1269 // and control will eventually pass from slow_exit() to inflate. The owner | |
| 1270 // will then spin, waiting for the 0 value to disappear. Put another way, | |
| 1271 // the 0 causes the owner to stall if the owner happens to try to | |
| 1272 // drop the lock (restoring the header from the basiclock to the object) | |
| 1273 // while inflation is in-progress. This protocol avoids races that might | |
| 1274 // would otherwise permit hashCode values to change or "flicker" for an object. | |
| 1275 // Critically, while object->mark is 0 mark->displaced_mark_helper() is stable. | |
| 1276 // 0 serves as a "BUSY" inflate-in-progress indicator. | |
| 1277 | |
| 1278 | |
| 1279 // fetch the displaced mark from the owner's stack. | |
| 1280 // The owner can't die or unwind past the lock while our INFLATING | |
| 1281 // object is in the mark. Furthermore the owner can't complete | |
| 1282 // an unlock on the object, either. | |
| 1283 markOop dmw = mark->displaced_mark_helper() ; | |
| 1284 assert (dmw->is_neutral(), "invariant") ; | |
| 1285 | |
| 1286 // Setup monitor fields to proper values -- prepare the monitor | |
| 1287 m->set_header(dmw) ; | |
| 1288 | |
| 1289 // Optimization: if the mark->locker stack address is associated | |
| 1290 // with this thread we could simply set m->_owner = Self and | |
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1291 // m->OwnerIsThread = 1. Note that a thread can inflate an object |
| 0 | 1292 // that it has stack-locked -- as might happen in wait() -- directly |
| 1293 // with CAS. That is, we can avoid the xchg-NULL .... ST idiom. | |
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1294 m->set_owner(mark->locker()); |
| 0 | 1295 m->set_object(object); |
| 1296 // TODO-FIXME: assert BasicLock->dhw != 0. | |
| 1297 | |
| 1298 // Must preserve store ordering. The monitor state must | |
| 1299 // be stable at the time of publishing the monitor address. | |
| 1300 guarantee (object->mark() == markOopDesc::INFLATING(), "invariant") ; | |
| 1301 object->release_set_mark(markOopDesc::encode(m)); | |
| 1302 | |
| 1303 // Hopefully the performance counters are allocated on distinct cache lines | |
| 1304 // to avoid false sharing on MP systems ... | |
| 1305 if (_sync_Inflations != NULL) _sync_Inflations->inc() ; | |
| 1306 TEVENT(Inflate: overwrite stacklock) ; | |
| 1307 if (TraceMonitorInflation) { | |
| 1308 if (object->is_instance()) { | |
| 1309 ResourceMark rm; | |
| 1310 tty->print_cr("Inflating object " INTPTR_FORMAT " , mark " INTPTR_FORMAT " , type %s", | |
| 1311 (intptr_t) object, (intptr_t) object->mark(), | |
| 1312 Klass::cast(object->klass())->external_name()); | |
| 1313 } | |
| 1314 } | |
| 1315 return m ; | |
| 1316 } | |
| 1317 | |
| 1318 // CASE: neutral | |
| 1319 // TODO-FIXME: for entry we currently inflate and then try to CAS _owner. | |
| 1320 // If we know we're inflating for entry it's better to inflate by swinging a | |
| 1321 // pre-locked objectMonitor pointer into the object header. A successful | |
| 1322 // CAS inflates the object *and* confers ownership to the inflating thread. | |
| 1323 // In the current implementation we use a 2-step mechanism where we CAS() | |
| 1324 // to inflate and then CAS() again to try to swing _owner from NULL to Self. | |
| 1325 // An inflateTry() method that we could call from fast_enter() and slow_enter() | |
| 1326 // would be useful. | |
| 1327 | |
| 1328 assert (mark->is_neutral(), "invariant"); | |
| 1329 ObjectMonitor * m = omAlloc (Self) ; | |
| 1330 // prepare m for installation - set monitor to initial state | |
| 1331 m->Recycle(); | |
| 1332 m->set_header(mark); | |
| 1333 m->set_owner(NULL); | |
| 1334 m->set_object(object); | |
| 1335 m->OwnerIsThread = 1 ; | |
| 1336 m->_recursions = 0 ; | |
| 1337 m->_Responsible = NULL ; | |
| 1338 m->_SpinDuration = Knob_SpinLimit ; // consider: keep metastats by type/class | |
| 1339 | |
| 1340 if (Atomic::cmpxchg_ptr (markOopDesc::encode(m), object->mark_addr(), mark) != mark) { | |
| 1341 m->set_object (NULL) ; | |
| 1342 m->set_owner (NULL) ; | |
| 1343 m->OwnerIsThread = 0 ; | |
| 1344 m->Recycle() ; | |
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1345 omRelease (Self, m, true) ; |
| 0 | 1346 m = NULL ; |
| 1347 continue ; | |
| 1348 // interference - the markword changed - just retry. | |
| 1349 // The state-transitions are one-way, so there's no chance of | |
| 1350 // live-lock -- "Inflated" is an absorbing state. | |
| 1351 } | |
| 1352 | |
| 1353 // Hopefully the performance counters are allocated on distinct | |
| 1354 // cache lines to avoid false sharing on MP systems ... | |
| 1355 if (_sync_Inflations != NULL) _sync_Inflations->inc() ; | |
| 1356 TEVENT(Inflate: overwrite neutral) ; | |
| 1357 if (TraceMonitorInflation) { | |
| 1358 if (object->is_instance()) { | |
| 1359 ResourceMark rm; | |
| 1360 tty->print_cr("Inflating object " INTPTR_FORMAT " , mark " INTPTR_FORMAT " , type %s", | |
| 1361 (intptr_t) object, (intptr_t) object->mark(), | |
| 1362 Klass::cast(object->klass())->external_name()); | |
| 1363 } | |
| 1364 } | |
| 1365 return m ; | |
| 1366 } | |
| 1367 } | |
| 1368 | |
| 1369 | |
| 1370 // This the fast monitor enter. The interpreter and compiler use | |
| 1371 // some assembly copies of this code. Make sure update those code | |
| 1372 // if the following function is changed. The implementation is | |
| 1373 // extremely sensitive to race condition. Be careful. | |
| 1374 | |
| 1375 void ObjectSynchronizer::fast_enter(Handle obj, BasicLock* lock, bool attempt_rebias, TRAPS) { | |
| 1376 if (UseBiasedLocking) { | |
| 1377 if (!SafepointSynchronize::is_at_safepoint()) { | |
| 1378 BiasedLocking::Condition cond = BiasedLocking::revoke_and_rebias(obj, attempt_rebias, THREAD); | |
| 1379 if (cond == BiasedLocking::BIAS_REVOKED_AND_REBIASED) { | |
| 1380 return; | |
| 1381 } | |
| 1382 } else { | |
| 1383 assert(!attempt_rebias, "can not rebias toward VM thread"); | |
| 1384 BiasedLocking::revoke_at_safepoint(obj); | |
| 1385 } | |
| 1386 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
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1387 } |
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1388 |
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1389 slow_enter (obj, lock, THREAD) ; |
| 0 | 1390 } |
| 1391 | |
| 1392 void ObjectSynchronizer::fast_exit(oop object, BasicLock* lock, TRAPS) { | |
| 1393 assert(!object->mark()->has_bias_pattern(), "should not see bias pattern here"); | |
| 1394 // if displaced header is null, the previous enter is recursive enter, no-op | |
| 1395 markOop dhw = lock->displaced_header(); | |
| 1396 markOop mark ; | |
| 1397 if (dhw == NULL) { | |
| 1398 // Recursive stack-lock. | |
| 1399 // Diagnostics -- Could be: stack-locked, inflating, inflated. | |
| 1400 mark = object->mark() ; | |
| 1401 assert (!mark->is_neutral(), "invariant") ; | |
| 1402 if (mark->has_locker() && mark != markOopDesc::INFLATING()) { | |
| 1403 assert(THREAD->is_lock_owned((address)mark->locker()), "invariant") ; | |
| 1404 } | |
| 1405 if (mark->has_monitor()) { | |
| 1406 ObjectMonitor * m = mark->monitor() ; | |
| 1407 assert(((oop)(m->object()))->mark() == mark, "invariant") ; | |
| 1408 assert(m->is_entered(THREAD), "invariant") ; | |
| 1409 } | |
| 1410 return ; | |
| 1411 } | |
| 1412 | |
| 1413 mark = object->mark() ; | |
| 1414 | |
| 1415 // If the object is stack-locked by the current thread, try to | |
| 1416 // swing the displaced header from the box back to the mark. | |
| 1417 if (mark == (markOop) lock) { | |
| 1418 assert (dhw->is_neutral(), "invariant") ; | |
| 1419 if ((markOop) Atomic::cmpxchg_ptr (dhw, object->mark_addr(), mark) == mark) { | |
| 1420 TEVENT (fast_exit: release stacklock) ; | |
| 1421 return; | |
| 1422 } | |
| 1423 } | |
| 1424 | |
| 1425 ObjectSynchronizer::inflate(THREAD, object)->exit (THREAD) ; | |
| 1426 } | |
| 1427 | |
| 1428 // This routine is used to handle interpreter/compiler slow case | |
| 1429 // We don't need to use fast path here, because it must have been | |
| 1430 // failed in the interpreter/compiler code. | |
| 1431 void ObjectSynchronizer::slow_enter(Handle obj, BasicLock* lock, TRAPS) { | |
| 1432 markOop mark = obj->mark(); | |
| 1433 assert(!mark->has_bias_pattern(), "should not see bias pattern here"); | |
| 1434 | |
| 1435 if (mark->is_neutral()) { | |
| 1436 // Anticipate successful CAS -- the ST of the displaced mark must | |
| 1437 // be visible <= the ST performed by the CAS. | |
| 1438 lock->set_displaced_header(mark); | |
| 1439 if (mark == (markOop) Atomic::cmpxchg_ptr(lock, obj()->mark_addr(), mark)) { | |
| 1440 TEVENT (slow_enter: release stacklock) ; | |
| 1441 return ; | |
| 1442 } | |
| 1443 // Fall through to inflate() ... | |
| 1444 } else | |
| 1445 if (mark->has_locker() && THREAD->is_lock_owned((address)mark->locker())) { | |
| 1446 assert(lock != mark->locker(), "must not re-lock the same lock"); | |
| 1447 assert(lock != (BasicLock*)obj->mark(), "don't relock with same BasicLock"); | |
| 1448 lock->set_displaced_header(NULL); | |
| 1449 return; | |
| 1450 } | |
| 1451 | |
| 1452 #if 0 | |
| 1453 // The following optimization isn't particularly useful. | |
| 1454 if (mark->has_monitor() && mark->monitor()->is_entered(THREAD)) { | |
| 1455 lock->set_displaced_header (NULL) ; | |
| 1456 return ; | |
| 1457 } | |
| 1458 #endif | |
| 1459 | |
| 1460 // The object header will never be displaced to this lock, | |
| 1461 // so it does not matter what the value is, except that it | |
| 1462 // must be non-zero to avoid looking like a re-entrant lock, | |
| 1463 // and must not look locked either. | |
| 1464 lock->set_displaced_header(markOopDesc::unused_mark()); | |
| 1465 ObjectSynchronizer::inflate(THREAD, obj())->enter(THREAD); | |
| 1466 } | |
| 1467 | |
| 1468 // This routine is used to handle interpreter/compiler slow case | |
| 1469 // We don't need to use fast path here, because it must have | |
| 1470 // failed in the interpreter/compiler code. Simply use the heavy | |
| 1471 // weight monitor should be ok, unless someone find otherwise. | |
| 1472 void ObjectSynchronizer::slow_exit(oop object, BasicLock* lock, TRAPS) { | |
| 1473 fast_exit (object, lock, THREAD) ; | |
| 1474 } | |
| 1475 | |
| 1476 // NOTE: must use heavy weight monitor to handle jni monitor enter | |
| 1477 void ObjectSynchronizer::jni_enter(Handle obj, TRAPS) { // possible entry from jni enter | |
| 1478 // the current locking is from JNI instead of Java code | |
| 1479 TEVENT (jni_enter) ; | |
| 1480 if (UseBiasedLocking) { | |
| 1481 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1482 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1483 } | |
| 1484 THREAD->set_current_pending_monitor_is_from_java(false); | |
| 1485 ObjectSynchronizer::inflate(THREAD, obj())->enter(THREAD); | |
| 1486 THREAD->set_current_pending_monitor_is_from_java(true); | |
| 1487 } | |
| 1488 | |
| 1489 // NOTE: must use heavy weight monitor to handle jni monitor enter | |
| 1490 bool ObjectSynchronizer::jni_try_enter(Handle obj, Thread* THREAD) { | |
| 1491 if (UseBiasedLocking) { | |
| 1492 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1493 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1494 } | |
| 1495 | |
| 1496 ObjectMonitor* monitor = ObjectSynchronizer::inflate_helper(obj()); | |
| 1497 return monitor->try_enter(THREAD); | |
| 1498 } | |
| 1499 | |
| 1500 | |
| 1501 // NOTE: must use heavy weight monitor to handle jni monitor exit | |
| 1502 void ObjectSynchronizer::jni_exit(oop obj, Thread* THREAD) { | |
| 1503 TEVENT (jni_exit) ; | |
| 1504 if (UseBiasedLocking) { | |
| 1505 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1506 } | |
| 1507 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1508 | |
| 1509 ObjectMonitor* monitor = ObjectSynchronizer::inflate(THREAD, obj); | |
| 1510 // If this thread has locked the object, exit the monitor. Note: can't use | |
| 1511 // monitor->check(CHECK); must exit even if an exception is pending. | |
| 1512 if (monitor->check(THREAD)) { | |
| 1513 monitor->exit(THREAD); | |
| 1514 } | |
| 1515 } | |
| 1516 | |
| 1517 // complete_exit()/reenter() are used to wait on a nested lock | |
| 1518 // i.e. to give up an outer lock completely and then re-enter | |
| 1519 // Used when holding nested locks - lock acquisition order: lock1 then lock2 | |
| 1520 // 1) complete_exit lock1 - saving recursion count | |
| 1521 // 2) wait on lock2 | |
| 1522 // 3) when notified on lock2, unlock lock2 | |
| 1523 // 4) reenter lock1 with original recursion count | |
| 1524 // 5) lock lock2 | |
| 1525 // NOTE: must use heavy weight monitor to handle complete_exit/reenter() | |
| 1526 intptr_t ObjectSynchronizer::complete_exit(Handle obj, TRAPS) { | |
| 1527 TEVENT (complete_exit) ; | |
| 1528 if (UseBiasedLocking) { | |
| 1529 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1530 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1531 } | |
| 1532 | |
| 1533 ObjectMonitor* monitor = ObjectSynchronizer::inflate(THREAD, obj()); | |
| 1534 | |
| 1535 return monitor->complete_exit(THREAD); | |
| 1536 } | |
| 1537 | |
| 1538 // NOTE: must use heavy weight monitor to handle complete_exit/reenter() | |
| 1539 void ObjectSynchronizer::reenter(Handle obj, intptr_t recursion, TRAPS) { | |
| 1540 TEVENT (reenter) ; | |
| 1541 if (UseBiasedLocking) { | |
| 1542 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1543 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1544 } | |
| 1545 | |
| 1546 ObjectMonitor* monitor = ObjectSynchronizer::inflate(THREAD, obj()); | |
| 1547 | |
| 1548 monitor->reenter(recursion, THREAD); | |
| 1549 } | |
| 1550 | |
| 1551 // This exists only as a workaround of dtrace bug 6254741 | |
| 1552 int dtrace_waited_probe(ObjectMonitor* monitor, Handle obj, Thread* thr) { | |
| 1553 DTRACE_MONITOR_PROBE(waited, monitor, obj(), thr); | |
| 1554 return 0; | |
| 1555 } | |
| 1556 | |
| 1557 // NOTE: must use heavy weight monitor to handle wait() | |
| 1558 void ObjectSynchronizer::wait(Handle obj, jlong millis, TRAPS) { | |
| 1559 if (UseBiasedLocking) { | |
| 1560 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1561 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1562 } | |
| 1563 if (millis < 0) { | |
| 1564 TEVENT (wait - throw IAX) ; | |
| 1565 THROW_MSG(vmSymbols::java_lang_IllegalArgumentException(), "timeout value is negative"); | |
| 1566 } | |
| 1567 ObjectMonitor* monitor = ObjectSynchronizer::inflate(THREAD, obj()); | |
| 1568 DTRACE_MONITOR_WAIT_PROBE(monitor, obj(), THREAD, millis); | |
| 1569 monitor->wait(millis, true, THREAD); | |
| 1570 | |
| 1571 /* This dummy call is in place to get around dtrace bug 6254741. Once | |
| 1572 that's fixed we can uncomment the following line and remove the call */ | |
| 1573 // DTRACE_MONITOR_PROBE(waited, monitor, obj(), THREAD); | |
| 1574 dtrace_waited_probe(monitor, obj, THREAD); | |
| 1575 } | |
| 1576 | |
| 1577 void ObjectSynchronizer::waitUninterruptibly (Handle obj, jlong millis, TRAPS) { | |
| 1578 if (UseBiasedLocking) { | |
| 1579 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1580 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1581 } | |
| 1582 if (millis < 0) { | |
| 1583 TEVENT (wait - throw IAX) ; | |
| 1584 THROW_MSG(vmSymbols::java_lang_IllegalArgumentException(), "timeout value is negative"); | |
| 1585 } | |
| 1586 ObjectSynchronizer::inflate(THREAD, obj()) -> wait(millis, false, THREAD) ; | |
| 1587 } | |
| 1588 | |
| 1589 void ObjectSynchronizer::notify(Handle obj, TRAPS) { | |
| 1590 if (UseBiasedLocking) { | |
| 1591 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1592 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1593 } | |
| 1594 | |
| 1595 markOop mark = obj->mark(); | |
| 1596 if (mark->has_locker() && THREAD->is_lock_owned((address)mark->locker())) { | |
| 1597 return; | |
| 1598 } | |
| 1599 ObjectSynchronizer::inflate(THREAD, obj())->notify(THREAD); | |
| 1600 } | |
| 1601 | |
| 1602 // NOTE: see comment of notify() | |
| 1603 void ObjectSynchronizer::notifyall(Handle obj, TRAPS) { | |
| 1604 if (UseBiasedLocking) { | |
| 1605 BiasedLocking::revoke_and_rebias(obj, false, THREAD); | |
| 1606 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1607 } | |
| 1608 | |
| 1609 markOop mark = obj->mark(); | |
| 1610 if (mark->has_locker() && THREAD->is_lock_owned((address)mark->locker())) { | |
| 1611 return; | |
| 1612 } | |
| 1613 ObjectSynchronizer::inflate(THREAD, obj())->notifyAll(THREAD); | |
| 1614 } | |
| 1615 | |
| 1616 intptr_t ObjectSynchronizer::FastHashCode (Thread * Self, oop obj) { | |
| 1617 if (UseBiasedLocking) { | |
| 1618 // NOTE: many places throughout the JVM do not expect a safepoint | |
| 1619 // to be taken here, in particular most operations on perm gen | |
| 1620 // objects. However, we only ever bias Java instances and all of | |
| 1621 // the call sites of identity_hash that might revoke biases have | |
| 1622 // been checked to make sure they can handle a safepoint. The | |
| 1623 // added check of the bias pattern is to avoid useless calls to | |
| 1624 // thread-local storage. | |
| 1625 if (obj->mark()->has_bias_pattern()) { | |
| 1626 // Box and unbox the raw reference just in case we cause a STW safepoint. | |
| 1627 Handle hobj (Self, obj) ; | |
| 1628 // Relaxing assertion for bug 6320749. | |
| 1629 assert (Universe::verify_in_progress() || | |
| 1630 !SafepointSynchronize::is_at_safepoint(), | |
| 1631 "biases should not be seen by VM thread here"); | |
| 1632 BiasedLocking::revoke_and_rebias(hobj, false, JavaThread::current()); | |
| 1633 obj = hobj() ; | |
| 1634 assert(!obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1635 } | |
| 1636 } | |
| 1637 | |
| 1638 // hashCode() is a heap mutator ... | |
| 1639 // Relaxing assertion for bug 6320749. | |
| 1640 assert (Universe::verify_in_progress() || | |
| 1641 !SafepointSynchronize::is_at_safepoint(), "invariant") ; | |
| 1642 assert (Universe::verify_in_progress() || | |
| 1643 Self->is_Java_thread() , "invariant") ; | |
| 1644 assert (Universe::verify_in_progress() || | |
| 1645 ((JavaThread *)Self)->thread_state() != _thread_blocked, "invariant") ; | |
| 1646 | |
| 1647 ObjectMonitor* monitor = NULL; | |
| 1648 markOop temp, test; | |
| 1649 intptr_t hash; | |
| 1650 markOop mark = ReadStableMark (obj); | |
| 1651 | |
| 1652 // object should remain ineligible for biased locking | |
| 1653 assert (!mark->has_bias_pattern(), "invariant") ; | |
| 1654 | |
| 1655 if (mark->is_neutral()) { | |
| 1656 hash = mark->hash(); // this is a normal header | |
| 1657 if (hash) { // if it has hash, just return it | |
| 1658 return hash; | |
| 1659 } | |
| 1660 hash = get_next_hash(Self, obj); // allocate a new hash code | |
| 1661 temp = mark->copy_set_hash(hash); // merge the hash code into header | |
| 1662 // use (machine word version) atomic operation to install the hash | |
| 1663 test = (markOop) Atomic::cmpxchg_ptr(temp, obj->mark_addr(), mark); | |
| 1664 if (test == mark) { | |
| 1665 return hash; | |
| 1666 } | |
| 1667 // If atomic operation failed, we must inflate the header | |
| 1668 // into heavy weight monitor. We could add more code here | |
| 1669 // for fast path, but it does not worth the complexity. | |
| 1670 } else if (mark->has_monitor()) { | |
| 1671 monitor = mark->monitor(); | |
| 1672 temp = monitor->header(); | |
| 1673 assert (temp->is_neutral(), "invariant") ; | |
| 1674 hash = temp->hash(); | |
| 1675 if (hash) { | |
| 1676 return hash; | |
| 1677 } | |
| 1678 // Skip to the following code to reduce code size | |
| 1679 } else if (Self->is_lock_owned((address)mark->locker())) { | |
| 1680 temp = mark->displaced_mark_helper(); // this is a lightweight monitor owned | |
| 1681 assert (temp->is_neutral(), "invariant") ; | |
| 1682 hash = temp->hash(); // by current thread, check if the displaced | |
| 1683 if (hash) { // header contains hash code | |
| 1684 return hash; | |
| 1685 } | |
| 1686 // WARNING: | |
| 1687 // The displaced header is strictly immutable. | |
| 1688 // It can NOT be changed in ANY cases. So we have | |
| 1689 // to inflate the header into heavyweight monitor | |
| 1690 // even the current thread owns the lock. The reason | |
| 1691 // is the BasicLock (stack slot) will be asynchronously | |
| 1692 // read by other threads during the inflate() function. | |
| 1693 // Any change to stack may not propagate to other threads | |
| 1694 // correctly. | |
| 1695 } | |
| 1696 | |
| 1697 // Inflate the monitor to set hash code | |
| 1698 monitor = ObjectSynchronizer::inflate(Self, obj); | |
| 1699 // Load displaced header and check it has hash code | |
| 1700 mark = monitor->header(); | |
| 1701 assert (mark->is_neutral(), "invariant") ; | |
| 1702 hash = mark->hash(); | |
| 1703 if (hash == 0) { | |
| 1704 hash = get_next_hash(Self, obj); | |
| 1705 temp = mark->copy_set_hash(hash); // merge hash code into header | |
| 1706 assert (temp->is_neutral(), "invariant") ; | |
| 1707 test = (markOop) Atomic::cmpxchg_ptr(temp, monitor, mark); | |
| 1708 if (test != mark) { | |
| 1709 // The only update to the header in the monitor (outside GC) | |
| 1710 // is install the hash code. If someone add new usage of | |
| 1711 // displaced header, please update this code | |
| 1712 hash = test->hash(); | |
| 1713 assert (test->is_neutral(), "invariant") ; | |
| 1714 assert (hash != 0, "Trivial unexpected object/monitor header usage."); | |
| 1715 } | |
| 1716 } | |
| 1717 // We finally get the hash | |
| 1718 return hash; | |
| 1719 } | |
| 1720 | |
| 1721 // Deprecated -- use FastHashCode() instead. | |
| 1722 | |
| 1723 intptr_t ObjectSynchronizer::identity_hash_value_for(Handle obj) { | |
| 1724 return FastHashCode (Thread::current(), obj()) ; | |
| 1725 } | |
| 1726 | |
| 1727 bool ObjectSynchronizer::current_thread_holds_lock(JavaThread* thread, | |
| 1728 Handle h_obj) { | |
| 1729 if (UseBiasedLocking) { | |
| 1730 BiasedLocking::revoke_and_rebias(h_obj, false, thread); | |
| 1731 assert(!h_obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1732 } | |
| 1733 | |
| 1734 assert(thread == JavaThread::current(), "Can only be called on current thread"); | |
| 1735 oop obj = h_obj(); | |
| 1736 | |
| 1737 markOop mark = ReadStableMark (obj) ; | |
| 1738 | |
| 1739 // Uncontended case, header points to stack | |
| 1740 if (mark->has_locker()) { | |
| 1741 return thread->is_lock_owned((address)mark->locker()); | |
| 1742 } | |
| 1743 // Contended case, header points to ObjectMonitor (tagged pointer) | |
| 1744 if (mark->has_monitor()) { | |
| 1745 ObjectMonitor* monitor = mark->monitor(); | |
| 1746 return monitor->is_entered(thread) != 0 ; | |
| 1747 } | |
| 1748 // Unlocked case, header in place | |
| 1749 assert(mark->is_neutral(), "sanity check"); | |
| 1750 return false; | |
| 1751 } | |
| 1752 | |
| 1753 // Be aware of this method could revoke bias of the lock object. | |
| 1754 // This method querys the ownership of the lock handle specified by 'h_obj'. | |
| 1755 // If the current thread owns the lock, it returns owner_self. If no | |
| 1756 // thread owns the lock, it returns owner_none. Otherwise, it will return | |
| 1757 // ower_other. | |
| 1758 ObjectSynchronizer::LockOwnership ObjectSynchronizer::query_lock_ownership | |
| 1759 (JavaThread *self, Handle h_obj) { | |
| 1760 // The caller must beware this method can revoke bias, and | |
| 1761 // revocation can result in a safepoint. | |
| 1762 assert (!SafepointSynchronize::is_at_safepoint(), "invariant") ; | |
| 1763 assert (self->thread_state() != _thread_blocked , "invariant") ; | |
| 1764 | |
| 1765 // Possible mark states: neutral, biased, stack-locked, inflated | |
| 1766 | |
| 1767 if (UseBiasedLocking && h_obj()->mark()->has_bias_pattern()) { | |
| 1768 // CASE: biased | |
| 1769 BiasedLocking::revoke_and_rebias(h_obj, false, self); | |
| 1770 assert(!h_obj->mark()->has_bias_pattern(), | |
| 1771 "biases should be revoked by now"); | |
| 1772 } | |
| 1773 | |
| 1774 assert(self == JavaThread::current(), "Can only be called on current thread"); | |
| 1775 oop obj = h_obj(); | |
| 1776 markOop mark = ReadStableMark (obj) ; | |
| 1777 | |
| 1778 // CASE: stack-locked. Mark points to a BasicLock on the owner's stack. | |
| 1779 if (mark->has_locker()) { | |
| 1780 return self->is_lock_owned((address)mark->locker()) ? | |
| 1781 owner_self : owner_other; | |
| 1782 } | |
| 1783 | |
| 1784 // CASE: inflated. Mark (tagged pointer) points to an objectMonitor. | |
| 1785 // The Object:ObjectMonitor relationship is stable as long as we're | |
| 1786 // not at a safepoint. | |
| 1787 if (mark->has_monitor()) { | |
| 1788 void * owner = mark->monitor()->_owner ; | |
| 1789 if (owner == NULL) return owner_none ; | |
| 1790 return (owner == self || | |
| 1791 self->is_lock_owned((address)owner)) ? owner_self : owner_other; | |
| 1792 } | |
| 1793 | |
| 1794 // CASE: neutral | |
| 1795 assert(mark->is_neutral(), "sanity check"); | |
| 1796 return owner_none ; // it's unlocked | |
| 1797 } | |
| 1798 | |
| 1799 // FIXME: jvmti should call this | |
| 1800 JavaThread* ObjectSynchronizer::get_lock_owner(Handle h_obj, bool doLock) { | |
| 1801 if (UseBiasedLocking) { | |
| 1802 if (SafepointSynchronize::is_at_safepoint()) { | |
| 1803 BiasedLocking::revoke_at_safepoint(h_obj); | |
| 1804 } else { | |
| 1805 BiasedLocking::revoke_and_rebias(h_obj, false, JavaThread::current()); | |
| 1806 } | |
| 1807 assert(!h_obj->mark()->has_bias_pattern(), "biases should be revoked by now"); | |
| 1808 } | |
| 1809 | |
| 1810 oop obj = h_obj(); | |
| 1811 address owner = NULL; | |
| 1812 | |
| 1813 markOop mark = ReadStableMark (obj) ; | |
| 1814 | |
| 1815 // Uncontended case, header points to stack | |
| 1816 if (mark->has_locker()) { | |
| 1817 owner = (address) mark->locker(); | |
| 1818 } | |
| 1819 | |
| 1820 // Contended case, header points to ObjectMonitor (tagged pointer) | |
| 1821 if (mark->has_monitor()) { | |
| 1822 ObjectMonitor* monitor = mark->monitor(); | |
| 1823 assert(monitor != NULL, "monitor should be non-null"); | |
| 1824 owner = (address) monitor->owner(); | |
| 1825 } | |
| 1826 | |
| 1827 if (owner != NULL) { | |
| 1828 return Threads::owning_thread_from_monitor_owner(owner, doLock); | |
| 1829 } | |
| 1830 | |
| 1831 // Unlocked case, header in place | |
| 1832 // Cannot have assertion since this object may have been | |
| 1833 // locked by another thread when reaching here. | |
| 1834 // assert(mark->is_neutral(), "sanity check"); | |
| 1835 | |
| 1836 return NULL; | |
| 1837 } | |
| 1838 | |
| 1839 // Iterate through monitor cache and attempt to release thread's monitors | |
| 1840 // Gives up on a particular monitor if an exception occurs, but continues | |
| 1841 // the overall iteration, swallowing the exception. | |
| 1842 class ReleaseJavaMonitorsClosure: public MonitorClosure { | |
| 1843 private: | |
| 1844 TRAPS; | |
| 1845 | |
| 1846 public: | |
| 1847 ReleaseJavaMonitorsClosure(Thread* thread) : THREAD(thread) {} | |
| 1848 void do_monitor(ObjectMonitor* mid) { | |
| 1849 if (mid->owner() == THREAD) { | |
| 1850 (void)mid->complete_exit(CHECK); | |
| 1851 } | |
| 1852 } | |
| 1853 }; | |
| 1854 | |
| 1855 // Release all inflated monitors owned by THREAD. Lightweight monitors are | |
| 1856 // ignored. This is meant to be called during JNI thread detach which assumes | |
| 1857 // all remaining monitors are heavyweight. All exceptions are swallowed. | |
| 1858 // Scanning the extant monitor list can be time consuming. | |
| 1859 // A simple optimization is to add a per-thread flag that indicates a thread | |
| 1860 // called jni_monitorenter() during its lifetime. | |
| 1861 // | |
| 1862 // Instead of No_Savepoint_Verifier it might be cheaper to | |
| 1863 // use an idiom of the form: | |
| 1864 // auto int tmp = SafepointSynchronize::_safepoint_counter ; | |
| 1865 // <code that must not run at safepoint> | |
| 1866 // guarantee (((tmp ^ _safepoint_counter) | (tmp & 1)) == 0) ; | |
| 1867 // Since the tests are extremely cheap we could leave them enabled | |
| 1868 // for normal product builds. | |
| 1869 | |
| 1870 void ObjectSynchronizer::release_monitors_owned_by_thread(TRAPS) { | |
| 1871 assert(THREAD == JavaThread::current(), "must be current Java thread"); | |
| 1872 No_Safepoint_Verifier nsv ; | |
| 1873 ReleaseJavaMonitorsClosure rjmc(THREAD); | |
| 1874 Thread::muxAcquire(&ListLock, "release_monitors_owned_by_thread"); | |
| 1875 ObjectSynchronizer::monitors_iterate(&rjmc); | |
| 1876 Thread::muxRelease(&ListLock); | |
| 1877 THREAD->clear_pending_exception(); | |
| 1878 } | |
| 1879 | |
| 1880 // Visitors ... | |
| 1881 | |
| 1882 void ObjectSynchronizer::monitors_iterate(MonitorClosure* closure) { | |
| 1883 ObjectMonitor* block = gBlockList; | |
| 1884 ObjectMonitor* mid; | |
| 1885 while (block) { | |
| 1886 assert(block->object() == CHAINMARKER, "must be a block header"); | |
| 1887 for (int i = _BLOCKSIZE - 1; i > 0; i--) { | |
| 1888 mid = block + i; | |
| 1889 oop object = (oop) mid->object(); | |
| 1890 if (object != NULL) { | |
| 1891 closure->do_monitor(mid); | |
| 1892 } | |
| 1893 } | |
| 1894 block = (ObjectMonitor*) block->FreeNext; | |
| 1895 } | |
| 1896 } | |
| 1897 | |
| 1898 void ObjectSynchronizer::oops_do(OopClosure* f) { | |
| 1899 assert(SafepointSynchronize::is_at_safepoint(), "must be at safepoint"); | |
| 1900 for (ObjectMonitor* block = gBlockList; block != NULL; block = next(block)) { | |
| 1901 assert(block->object() == CHAINMARKER, "must be a block header"); | |
| 1902 for (int i = 1; i < _BLOCKSIZE; i++) { | |
| 1903 ObjectMonitor* mid = &block[i]; | |
| 1904 if (mid->object() != NULL) { | |
| 1905 f->do_oop((oop*)mid->object_addr()); | |
| 1906 } | |
| 1907 } | |
| 1908 } | |
| 1909 } | |
| 1910 | |
| 1911 // Deflate_idle_monitors() is called at all safepoints, immediately | |
| 1912 // after all mutators are stopped, but before any objects have moved. | |
| 1913 // It traverses the list of known monitors, deflating where possible. | |
| 1914 // The scavenged monitor are returned to the monitor free list. | |
| 1915 // | |
| 1916 // Beware that we scavenge at *every* stop-the-world point. | |
| 1917 // Having a large number of monitors in-circulation negatively | |
| 1918 // impacts the performance of some applications (e.g., PointBase). | |
| 1919 // Broadly, we want to minimize the # of monitors in circulation. | |
| 1587 | 1920 // |
| 1921 // We have added a flag, MonitorInUseLists, which creates a list | |
| 1922 // of active monitors for each thread. deflate_idle_monitors() | |
| 1923 // only scans the per-thread inuse lists. omAlloc() puts all | |
| 1924 // assigned monitors on the per-thread list. deflate_idle_monitors() | |
| 1925 // returns the non-busy monitors to the global free list. | |
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1926 // When a thread dies, omFlush() adds the list of active monitors for |
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1927 // that thread to a global gOmInUseList acquiring the |
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1928 // global list lock. deflate_idle_monitors() acquires the global |
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1929 // list lock to scan for non-busy monitors to the global free list. |
| 1587 | 1930 // An alternative could have used a single global inuse list. The |
| 1931 // downside would have been the additional cost of acquiring the global list lock | |
| 1932 // for every omAlloc(). | |
| 0 | 1933 // |
| 1934 // Perversely, the heap size -- and thus the STW safepoint rate -- | |
| 1935 // typically drives the scavenge rate. Large heaps can mean infrequent GC, | |
| 1936 // which in turn can mean large(r) numbers of objectmonitors in circulation. | |
| 1937 // This is an unfortunate aspect of this design. | |
| 1938 // | |
| 1939 // Another refinement would be to refrain from calling deflate_idle_monitors() | |
| 1940 // except at stop-the-world points associated with garbage collections. | |
| 1941 // | |
| 1942 // An even better solution would be to deflate on-the-fly, aggressively, | |
| 1943 // at monitorexit-time as is done in EVM's metalock or Relaxed Locks. | |
| 1944 | |
| 1587 | 1945 |
| 1946 // Deflate a single monitor if not in use | |
| 1947 // Return true if deflated, false if in use | |
| 1948 bool ObjectSynchronizer::deflate_monitor(ObjectMonitor* mid, oop obj, | |
| 1949 ObjectMonitor** FreeHeadp, ObjectMonitor** FreeTailp) { | |
| 1950 bool deflated; | |
| 1951 // Normal case ... The monitor is associated with obj. | |
| 1952 guarantee (obj->mark() == markOopDesc::encode(mid), "invariant") ; | |
| 1953 guarantee (mid == obj->mark()->monitor(), "invariant"); | |
| 1954 guarantee (mid->header()->is_neutral(), "invariant"); | |
| 1955 | |
| 1956 if (mid->is_busy()) { | |
| 1957 if (ClearResponsibleAtSTW) mid->_Responsible = NULL ; | |
| 1958 deflated = false; | |
| 1959 } else { | |
| 1960 // Deflate the monitor if it is no longer being used | |
| 1961 // It's idle - scavenge and return to the global free list | |
| 1962 // plain old deflation ... | |
| 1963 TEVENT (deflate_idle_monitors - scavenge1) ; | |
| 1964 if (TraceMonitorInflation) { | |
| 1965 if (obj->is_instance()) { | |
| 1966 ResourceMark rm; | |
| 1967 tty->print_cr("Deflating object " INTPTR_FORMAT " , mark " INTPTR_FORMAT " , type %s", | |
| 1968 (intptr_t) obj, (intptr_t) obj->mark(), Klass::cast(obj->klass())->external_name()); | |
| 1969 } | |
| 1970 } | |
| 1971 | |
| 1972 // Restore the header back to obj | |
| 1973 obj->release_set_mark(mid->header()); | |
| 1974 mid->clear(); | |
| 1975 | |
| 1976 assert (mid->object() == NULL, "invariant") ; | |
| 1977 | |
| 1978 // Move the object to the working free list defined by FreeHead,FreeTail. | |
| 1979 if (*FreeHeadp == NULL) *FreeHeadp = mid; | |
| 1980 if (*FreeTailp != NULL) { | |
| 1981 ObjectMonitor * prevtail = *FreeTailp; | |
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1982 assert(prevtail->FreeNext == NULL, "cleaned up deflated?"); // TODO KK |
| 1587 | 1983 prevtail->FreeNext = mid; |
| 1984 } | |
| 1985 *FreeTailp = mid; | |
| 1986 deflated = true; | |
| 1987 } | |
| 1988 return deflated; | |
| 1989 } | |
| 1990 | |
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1991 // Caller acquires ListLock |
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1992 int ObjectSynchronizer::walk_monitor_list(ObjectMonitor** listheadp, |
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1993 ObjectMonitor** FreeHeadp, ObjectMonitor** FreeTailp) { |
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1994 ObjectMonitor* mid; |
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1995 ObjectMonitor* next; |
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1996 ObjectMonitor* curmidinuse = NULL; |
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1997 int deflatedcount = 0; |
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1998 |
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1999 for (mid = *listheadp; mid != NULL; ) { |
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2000 oop obj = (oop) mid->object(); |
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2001 bool deflated = false; |
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2002 if (obj != NULL) { |
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2003 deflated = deflate_monitor(mid, obj, FreeHeadp, FreeTailp); |
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2004 } |
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2005 if (deflated) { |
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2006 // extract from per-thread in-use-list |
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2007 if (mid == *listheadp) { |
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2008 *listheadp = mid->FreeNext; |
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2009 } else if (curmidinuse != NULL) { |
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2010 curmidinuse->FreeNext = mid->FreeNext; // maintain the current thread inuselist |
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2011 } |
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2012 next = mid->FreeNext; |
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2013 mid->FreeNext = NULL; // This mid is current tail in the FreeHead list |
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2014 mid = next; |
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2015 deflatedcount++; |
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2016 } else { |
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2017 curmidinuse = mid; |
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2018 mid = mid->FreeNext; |
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2019 } |
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2020 } |
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2021 return deflatedcount; |
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2022 } |
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2023 |
| 0 | 2024 void ObjectSynchronizer::deflate_idle_monitors() { |
| 2025 assert(SafepointSynchronize::is_at_safepoint(), "must be at safepoint"); | |
| 2026 int nInuse = 0 ; // currently associated with objects | |
| 2027 int nInCirculation = 0 ; // extant | |
| 2028 int nScavenged = 0 ; // reclaimed | |
| 1587 | 2029 bool deflated = false; |
| 0 | 2030 |
| 2031 ObjectMonitor * FreeHead = NULL ; // Local SLL of scavenged monitors | |
| 2032 ObjectMonitor * FreeTail = NULL ; | |
| 2033 | |
| 1587 | 2034 TEVENT (deflate_idle_monitors) ; |
| 2035 // Prevent omFlush from changing mids in Thread dtor's during deflation | |
| 2036 // And in case the vm thread is acquiring a lock during a safepoint | |
| 2037 // See e.g. 6320749 | |
| 2038 Thread::muxAcquire (&ListLock, "scavenge - return") ; | |
| 2039 | |
| 2040 if (MonitorInUseLists) { | |
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2041 int inUse = 0; |
| 1587 | 2042 for (JavaThread* cur = Threads::first(); cur != NULL; cur = cur->next()) { |
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2043 nInCirculation+= cur->omInUseCount; |
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2044 int deflatedcount = walk_monitor_list(cur->omInUseList_addr(), &FreeHead, &FreeTail); |
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2045 cur->omInUseCount-= deflatedcount; |
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2046 // verifyInUse(cur); |
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2047 nScavenged += deflatedcount; |
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2048 nInuse += cur->omInUseCount; |
| 1587 | 2049 } |
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2050 |
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2051 // For moribund threads, scan gOmInUseList |
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2052 if (gOmInUseList) { |
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2053 nInCirculation += gOmInUseCount; |
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2054 int deflatedcount = walk_monitor_list((ObjectMonitor **)&gOmInUseList, &FreeHead, &FreeTail); |
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2055 gOmInUseCount-= deflatedcount; |
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2056 nScavenged += deflatedcount; |
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2057 nInuse += gOmInUseCount; |
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2058 } |
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2059 |
| 1587 | 2060 } else for (ObjectMonitor* block = gBlockList; block != NULL; block = next(block)) { |
| 0 | 2061 // Iterate over all extant monitors - Scavenge all idle monitors. |
| 2062 assert(block->object() == CHAINMARKER, "must be a block header"); | |
| 2063 nInCirculation += _BLOCKSIZE ; | |
| 2064 for (int i = 1 ; i < _BLOCKSIZE; i++) { | |
| 2065 ObjectMonitor* mid = &block[i]; | |
| 2066 oop obj = (oop) mid->object(); | |
| 2067 | |
| 2068 if (obj == NULL) { | |
| 2069 // The monitor is not associated with an object. | |
| 2070 // The monitor should either be a thread-specific private | |
| 2071 // free list or the global free list. | |
| 2072 // obj == NULL IMPLIES mid->is_busy() == 0 | |
| 2073 guarantee (!mid->is_busy(), "invariant") ; | |
| 2074 continue ; | |
| 2075 } | |
| 1587 | 2076 deflated = deflate_monitor(mid, obj, &FreeHead, &FreeTail); |
| 2077 | |
| 2078 if (deflated) { | |
| 2079 mid->FreeNext = NULL ; | |
| 2080 nScavenged ++ ; | |
| 0 | 2081 } else { |
| 1587 | 2082 nInuse ++; |
| 0 | 2083 } |
| 2084 } | |
| 2085 } | |
| 2086 | |
| 1587 | 2087 MonitorFreeCount += nScavenged; |
| 2088 | |
| 2089 // Consider: audit gFreeList to ensure that MonitorFreeCount and list agree. | |
| 2090 | |
| 2091 if (Knob_Verbose) { | |
| 2092 ::printf ("Deflate: InCirc=%d InUse=%d Scavenged=%d ForceMonitorScavenge=%d : pop=%d free=%d\n", | |
| 2093 nInCirculation, nInuse, nScavenged, ForceMonitorScavenge, | |
| 2094 MonitorPopulation, MonitorFreeCount) ; | |
| 2095 ::fflush(stdout) ; | |
| 2096 } | |
| 2097 | |
| 2098 ForceMonitorScavenge = 0; // Reset | |
| 2099 | |
| 0 | 2100 // Move the scavenged monitors back to the global free list. |
| 2101 if (FreeHead != NULL) { | |
| 2102 guarantee (FreeTail != NULL && nScavenged > 0, "invariant") ; | |
| 2103 assert (FreeTail->FreeNext == NULL, "invariant") ; | |
| 2104 // constant-time list splice - prepend scavenged segment to gFreeList | |
| 2105 FreeTail->FreeNext = gFreeList ; | |
| 2106 gFreeList = FreeHead ; | |
| 2107 } | |
| 1587 | 2108 Thread::muxRelease (&ListLock) ; |
| 0 | 2109 |
| 2110 if (_sync_Deflations != NULL) _sync_Deflations->inc(nScavenged) ; | |
| 2111 if (_sync_MonExtant != NULL) _sync_MonExtant ->set_value(nInCirculation); | |
| 2112 | |
| 2113 // TODO: Add objectMonitor leak detection. | |
| 2114 // Audit/inventory the objectMonitors -- make sure they're all accounted for. | |
| 2115 GVars.stwRandom = os::random() ; | |
| 2116 GVars.stwCycle ++ ; | |
| 2117 } | |
| 2118 | |
| 2119 // A macro is used below because there may already be a pending | |
| 2120 // exception which should not abort the execution of the routines | |
| 2121 // which use this (which is why we don't put this into check_slow and | |
| 2122 // call it with a CHECK argument). | |
| 2123 | |
| 2124 #define CHECK_OWNER() \ | |
| 2125 do { \ | |
| 2126 if (THREAD != _owner) { \ | |
| 2127 if (THREAD->is_lock_owned((address) _owner)) { \ | |
| 2128 _owner = THREAD ; /* Convert from basiclock addr to Thread addr */ \ | |
| 2129 _recursions = 0; \ | |
| 2130 OwnerIsThread = 1 ; \ | |
| 2131 } else { \ | |
| 2132 TEVENT (Throw IMSX) ; \ | |
| 2133 THROW(vmSymbols::java_lang_IllegalMonitorStateException()); \ | |
| 2134 } \ | |
| 2135 } \ | |
| 2136 } while (false) | |
| 2137 | |
| 2138 // TODO-FIXME: eliminate ObjectWaiters. Replace this visitor/enumerator | |
| 2139 // interface with a simple FirstWaitingThread(), NextWaitingThread() interface. | |
| 2140 | |
| 2141 ObjectWaiter* ObjectMonitor::first_waiter() { | |
| 2142 return _WaitSet; | |
| 2143 } | |
| 2144 | |
| 2145 ObjectWaiter* ObjectMonitor::next_waiter(ObjectWaiter* o) { | |
| 2146 return o->_next; | |
| 2147 } | |
| 2148 | |
| 2149 Thread* ObjectMonitor::thread_of_waiter(ObjectWaiter* o) { | |
| 2150 return o->_thread; | |
| 2151 } | |
| 2152 | |
| 2153 // initialize the monitor, exception the semaphore, all other fields | |
| 2154 // are simple integers or pointers | |
| 2155 ObjectMonitor::ObjectMonitor() { | |
| 2156 _header = NULL; | |
| 2157 _count = 0; | |
| 2158 _waiters = 0, | |
| 2159 _recursions = 0; | |
| 2160 _object = NULL; | |
| 2161 _owner = NULL; | |
| 2162 _WaitSet = NULL; | |
| 2163 _WaitSetLock = 0 ; | |
| 2164 _Responsible = NULL ; | |
| 2165 _succ = NULL ; | |
| 2166 _cxq = NULL ; | |
| 2167 FreeNext = NULL ; | |
| 2168 _EntryList = NULL ; | |
| 2169 _SpinFreq = 0 ; | |
| 2170 _SpinClock = 0 ; | |
| 2171 OwnerIsThread = 0 ; | |
| 2172 } | |
| 2173 | |
| 2174 ObjectMonitor::~ObjectMonitor() { | |
| 2175 // TODO: Add asserts ... | |
| 2176 // _cxq == 0 _succ == NULL _owner == NULL _waiters == 0 | |
| 2177 // _count == 0 _EntryList == NULL etc | |
| 2178 } | |
| 2179 | |
| 2180 intptr_t ObjectMonitor::is_busy() const { | |
| 2181 // TODO-FIXME: merge _count and _waiters. | |
| 2182 // TODO-FIXME: assert _owner == null implies _recursions = 0 | |
| 2183 // TODO-FIXME: assert _WaitSet != null implies _count > 0 | |
| 2184 return _count|_waiters|intptr_t(_owner)|intptr_t(_cxq)|intptr_t(_EntryList ) ; | |
| 2185 } | |
| 2186 | |
| 2187 void ObjectMonitor::Recycle () { | |
| 2188 // TODO: add stronger asserts ... | |
| 2189 // _cxq == 0 _succ == NULL _owner == NULL _waiters == 0 | |
| 2190 // _count == 0 EntryList == NULL | |
| 2191 // _recursions == 0 _WaitSet == NULL | |
| 2192 // TODO: assert (is_busy()|_recursions) == 0 | |
| 2193 _succ = NULL ; | |
| 2194 _EntryList = NULL ; | |
| 2195 _cxq = NULL ; | |
| 2196 _WaitSet = NULL ; | |
| 2197 _recursions = 0 ; | |
| 2198 _SpinFreq = 0 ; | |
| 2199 _SpinClock = 0 ; | |
| 2200 OwnerIsThread = 0 ; | |
| 2201 } | |
| 2202 | |
| 2203 // WaitSet management ... | |
| 2204 | |
| 2205 inline void ObjectMonitor::AddWaiter(ObjectWaiter* node) { | |
| 2206 assert(node != NULL, "should not dequeue NULL node"); | |
| 2207 assert(node->_prev == NULL, "node already in list"); | |
| 2208 assert(node->_next == NULL, "node already in list"); | |
| 2209 // put node at end of queue (circular doubly linked list) | |
| 2210 if (_WaitSet == NULL) { | |
| 2211 _WaitSet = node; | |
| 2212 node->_prev = node; | |
| 2213 node->_next = node; | |
| 2214 } else { | |
| 2215 ObjectWaiter* head = _WaitSet ; | |
| 2216 ObjectWaiter* tail = head->_prev; | |
| 2217 assert(tail->_next == head, "invariant check"); | |
| 2218 tail->_next = node; | |
| 2219 head->_prev = node; | |
| 2220 node->_next = head; | |
| 2221 node->_prev = tail; | |
| 2222 } | |
| 2223 } | |
| 2224 | |
| 2225 inline ObjectWaiter* ObjectMonitor::DequeueWaiter() { | |
| 2226 // dequeue the very first waiter | |
| 2227 ObjectWaiter* waiter = _WaitSet; | |
| 2228 if (waiter) { | |
| 2229 DequeueSpecificWaiter(waiter); | |
| 2230 } | |
| 2231 return waiter; | |
| 2232 } | |
| 2233 | |
| 2234 inline void ObjectMonitor::DequeueSpecificWaiter(ObjectWaiter* node) { | |
| 2235 assert(node != NULL, "should not dequeue NULL node"); | |
| 2236 assert(node->_prev != NULL, "node already removed from list"); | |
| 2237 assert(node->_next != NULL, "node already removed from list"); | |
| 2238 // when the waiter has woken up because of interrupt, | |
| 2239 // timeout or other spurious wake-up, dequeue the | |
| 2240 // waiter from waiting list | |
| 2241 ObjectWaiter* next = node->_next; | |
| 2242 if (next == node) { | |
| 2243 assert(node->_prev == node, "invariant check"); | |
| 2244 _WaitSet = NULL; | |
| 2245 } else { | |
| 2246 ObjectWaiter* prev = node->_prev; | |
| 2247 assert(prev->_next == node, "invariant check"); | |
| 2248 assert(next->_prev == node, "invariant check"); | |
| 2249 next->_prev = prev; | |
| 2250 prev->_next = next; | |
| 2251 if (_WaitSet == node) { | |
| 2252 _WaitSet = next; | |
| 2253 } | |
| 2254 } | |
| 2255 node->_next = NULL; | |
| 2256 node->_prev = NULL; | |
| 2257 } | |
| 2258 | |
| 2259 static char * kvGet (char * kvList, const char * Key) { | |
| 2260 if (kvList == NULL) return NULL ; | |
| 2261 size_t n = strlen (Key) ; | |
| 2262 char * Search ; | |
| 2263 for (Search = kvList ; *Search ; Search += strlen(Search) + 1) { | |
| 2264 if (strncmp (Search, Key, n) == 0) { | |
| 2265 if (Search[n] == '=') return Search + n + 1 ; | |
| 2266 if (Search[n] == 0) return (char *) "1" ; | |
| 2267 } | |
| 2268 } | |
| 2269 return NULL ; | |
| 2270 } | |
| 2271 | |
| 2272 static int kvGetInt (char * kvList, const char * Key, int Default) { | |
| 2273 char * v = kvGet (kvList, Key) ; | |
| 2274 int rslt = v ? ::strtol (v, NULL, 0) : Default ; | |
| 2275 if (Knob_ReportSettings && v != NULL) { | |
| 2276 ::printf (" SyncKnob: %s %d(%d)\n", Key, rslt, Default) ; | |
| 2277 ::fflush (stdout) ; | |
| 2278 } | |
| 2279 return rslt ; | |
| 2280 } | |
| 2281 | |
| 2282 // By convention we unlink a contending thread from EntryList|cxq immediately | |
| 2283 // after the thread acquires the lock in ::enter(). Equally, we could defer | |
| 2284 // unlinking the thread until ::exit()-time. | |
| 2285 | |
| 2286 void ObjectMonitor::UnlinkAfterAcquire (Thread * Self, ObjectWaiter * SelfNode) | |
| 2287 { | |
| 2288 assert (_owner == Self, "invariant") ; | |
| 2289 assert (SelfNode->_thread == Self, "invariant") ; | |
| 2290 | |
| 2291 if (SelfNode->TState == ObjectWaiter::TS_ENTER) { | |
| 2292 // Normal case: remove Self from the DLL EntryList . | |
| 2293 // This is a constant-time operation. | |
| 2294 ObjectWaiter * nxt = SelfNode->_next ; | |
| 2295 ObjectWaiter * prv = SelfNode->_prev ; | |
| 2296 if (nxt != NULL) nxt->_prev = prv ; | |
| 2297 if (prv != NULL) prv->_next = nxt ; | |
| 2298 if (SelfNode == _EntryList ) _EntryList = nxt ; | |
| 2299 assert (nxt == NULL || nxt->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 2300 assert (prv == NULL || prv->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 2301 TEVENT (Unlink from EntryList) ; | |
| 2302 } else { | |
| 2303 guarantee (SelfNode->TState == ObjectWaiter::TS_CXQ, "invariant") ; | |
| 2304 // Inopportune interleaving -- Self is still on the cxq. | |
| 2305 // This usually means the enqueue of self raced an exiting thread. | |
| 2306 // Normally we'll find Self near the front of the cxq, so | |
| 2307 // dequeueing is typically fast. If needbe we can accelerate | |
| 2308 // this with some MCS/CHL-like bidirectional list hints and advisory | |
| 2309 // back-links so dequeueing from the interior will normally operate | |
| 2310 // in constant-time. | |
| 2311 // Dequeue Self from either the head (with CAS) or from the interior | |
| 2312 // with a linear-time scan and normal non-atomic memory operations. | |
| 2313 // CONSIDER: if Self is on the cxq then simply drain cxq into EntryList | |
| 2314 // and then unlink Self from EntryList. We have to drain eventually, | |
| 2315 // so it might as well be now. | |
| 2316 | |
| 2317 ObjectWaiter * v = _cxq ; | |
| 2318 assert (v != NULL, "invariant") ; | |
| 2319 if (v != SelfNode || Atomic::cmpxchg_ptr (SelfNode->_next, &_cxq, v) != v) { | |
| 2320 // The CAS above can fail from interference IFF a "RAT" arrived. | |
| 2321 // In that case Self must be in the interior and can no longer be | |
| 2322 // at the head of cxq. | |
| 2323 if (v == SelfNode) { | |
| 2324 assert (_cxq != v, "invariant") ; | |
| 2325 v = _cxq ; // CAS above failed - start scan at head of list | |
| 2326 } | |
| 2327 ObjectWaiter * p ; | |
| 2328 ObjectWaiter * q = NULL ; | |
| 2329 for (p = v ; p != NULL && p != SelfNode; p = p->_next) { | |
| 2330 q = p ; | |
| 2331 assert (p->TState == ObjectWaiter::TS_CXQ, "invariant") ; | |
| 2332 } | |
| 2333 assert (v != SelfNode, "invariant") ; | |
| 2334 assert (p == SelfNode, "Node not found on cxq") ; | |
| 2335 assert (p != _cxq, "invariant") ; | |
| 2336 assert (q != NULL, "invariant") ; | |
| 2337 assert (q->_next == p, "invariant") ; | |
| 2338 q->_next = p->_next ; | |
| 2339 } | |
| 2340 TEVENT (Unlink from cxq) ; | |
| 2341 } | |
| 2342 | |
| 2343 // Diagnostic hygiene ... | |
| 2344 SelfNode->_prev = (ObjectWaiter *) 0xBAD ; | |
| 2345 SelfNode->_next = (ObjectWaiter *) 0xBAD ; | |
| 2346 SelfNode->TState = ObjectWaiter::TS_RUN ; | |
| 2347 } | |
| 2348 | |
| 2349 // Caveat: TryLock() is not necessarily serializing if it returns failure. | |
| 2350 // Callers must compensate as needed. | |
| 2351 | |
| 2352 int ObjectMonitor::TryLock (Thread * Self) { | |
| 2353 for (;;) { | |
| 2354 void * own = _owner ; | |
| 2355 if (own != NULL) return 0 ; | |
| 2356 if (Atomic::cmpxchg_ptr (Self, &_owner, NULL) == NULL) { | |
| 2357 // Either guarantee _recursions == 0 or set _recursions = 0. | |
| 2358 assert (_recursions == 0, "invariant") ; | |
| 2359 assert (_owner == Self, "invariant") ; | |
| 2360 // CONSIDER: set or assert that OwnerIsThread == 1 | |
| 2361 return 1 ; | |
| 2362 } | |
| 2363 // The lock had been free momentarily, but we lost the race to the lock. | |
| 2364 // Interference -- the CAS failed. | |
| 2365 // We can either return -1 or retry. | |
| 2366 // Retry doesn't make as much sense because the lock was just acquired. | |
| 2367 if (true) return -1 ; | |
| 2368 } | |
| 2369 } | |
| 2370 | |
| 2371 // NotRunnable() -- informed spinning | |
| 2372 // | |
| 2373 // Don't bother spinning if the owner is not eligible to drop the lock. | |
| 2374 // Peek at the owner's schedctl.sc_state and Thread._thread_values and | |
| 2375 // spin only if the owner thread is _thread_in_Java or _thread_in_vm. | |
| 2376 // The thread must be runnable in order to drop the lock in timely fashion. | |
| 2377 // If the _owner is not runnable then spinning will not likely be | |
| 2378 // successful (profitable). | |
| 2379 // | |
| 2380 // Beware -- the thread referenced by _owner could have died | |
| 2381 // so a simply fetch from _owner->_thread_state might trap. | |
| 2382 // Instead, we use SafeFetchXX() to safely LD _owner->_thread_state. | |
| 2383 // Because of the lifecycle issues the schedctl and _thread_state values | |
| 2384 // observed by NotRunnable() might be garbage. NotRunnable must | |
| 2385 // tolerate this and consider the observed _thread_state value | |
| 2386 // as advisory. | |
| 2387 // | |
| 2388 // Beware too, that _owner is sometimes a BasicLock address and sometimes | |
| 2389 // a thread pointer. We differentiate the two cases with OwnerIsThread. | |
| 2390 // Alternately, we might tag the type (thread pointer vs basiclock pointer) | |
| 2391 // with the LSB of _owner. Another option would be to probablistically probe | |
| 2392 // the putative _owner->TypeTag value. | |
| 2393 // | |
| 2394 // Checking _thread_state isn't perfect. Even if the thread is | |
| 2395 // in_java it might be blocked on a page-fault or have been preempted | |
| 2396 // and sitting on a ready/dispatch queue. _thread state in conjunction | |
| 2397 // with schedctl.sc_state gives us a good picture of what the | |
| 2398 // thread is doing, however. | |
| 2399 // | |
| 2400 // TODO: check schedctl.sc_state. | |
| 2401 // We'll need to use SafeFetch32() to read from the schedctl block. | |
| 2402 // See RFE #5004247 and http://sac.sfbay.sun.com/Archives/CaseLog/arc/PSARC/2005/351/ | |
| 2403 // | |
| 2404 // The return value from NotRunnable() is *advisory* -- the | |
| 2405 // result is based on sampling and is not necessarily coherent. | |
| 2406 // The caller must tolerate false-negative and false-positive errors. | |
| 2407 // Spinning, in general, is probabilistic anyway. | |
| 2408 | |
| 2409 | |
| 2410 int ObjectMonitor::NotRunnable (Thread * Self, Thread * ox) { | |
| 2411 // Check either OwnerIsThread or ox->TypeTag == 2BAD. | |
| 2412 if (!OwnerIsThread) return 0 ; | |
| 2413 | |
| 2414 if (ox == NULL) return 0 ; | |
| 2415 | |
| 2416 // Avoid transitive spinning ... | |
| 2417 // Say T1 spins or blocks trying to acquire L. T1._Stalled is set to L. | |
| 2418 // Immediately after T1 acquires L it's possible that T2, also | |
| 2419 // spinning on L, will see L.Owner=T1 and T1._Stalled=L. | |
| 2420 // This occurs transiently after T1 acquired L but before | |
| 2421 // T1 managed to clear T1.Stalled. T2 does not need to abort | |
| 2422 // its spin in this circumstance. | |
| 2423 intptr_t BlockedOn = SafeFetchN ((intptr_t *) &ox->_Stalled, intptr_t(1)) ; | |
| 2424 | |
| 2425 if (BlockedOn == 1) return 1 ; | |
| 2426 if (BlockedOn != 0) { | |
| 2427 return BlockedOn != intptr_t(this) && _owner == ox ; | |
| 2428 } | |
| 2429 | |
| 2430 assert (sizeof(((JavaThread *)ox)->_thread_state == sizeof(int)), "invariant") ; | |
| 2431 int jst = SafeFetch32 ((int *) &((JavaThread *) ox)->_thread_state, -1) ; ; | |
| 2432 // consider also: jst != _thread_in_Java -- but that's overspecific. | |
| 2433 return jst == _thread_blocked || jst == _thread_in_native ; | |
| 2434 } | |
| 2435 | |
| 2436 | |
| 2437 // Adaptive spin-then-block - rational spinning | |
| 2438 // | |
| 2439 // Note that we spin "globally" on _owner with a classic SMP-polite TATAS | |
| 2440 // algorithm. On high order SMP systems it would be better to start with | |
| 2441 // a brief global spin and then revert to spinning locally. In the spirit of MCS/CLH, | |
| 2442 // a contending thread could enqueue itself on the cxq and then spin locally | |
| 2443 // on a thread-specific variable such as its ParkEvent._Event flag. | |
| 2444 // That's left as an exercise for the reader. Note that global spinning is | |
| 2445 // not problematic on Niagara, as the L2$ serves the interconnect and has both | |
| 2446 // low latency and massive bandwidth. | |
| 2447 // | |
| 2448 // Broadly, we can fix the spin frequency -- that is, the % of contended lock | |
| 2449 // acquisition attempts where we opt to spin -- at 100% and vary the spin count | |
| 2450 // (duration) or we can fix the count at approximately the duration of | |
| 2451 // a context switch and vary the frequency. Of course we could also | |
| 2452 // vary both satisfying K == Frequency * Duration, where K is adaptive by monitor. | |
| 2453 // See http://j2se.east/~dice/PERSIST/040824-AdaptiveSpinning.html. | |
| 2454 // | |
| 2455 // This implementation varies the duration "D", where D varies with | |
| 2456 // the success rate of recent spin attempts. (D is capped at approximately | |
| 2457 // length of a round-trip context switch). The success rate for recent | |
| 2458 // spin attempts is a good predictor of the success rate of future spin | |
| 2459 // attempts. The mechanism adapts automatically to varying critical | |
| 2460 // section length (lock modality), system load and degree of parallelism. | |
| 2461 // D is maintained per-monitor in _SpinDuration and is initialized | |
| 2462 // optimistically. Spin frequency is fixed at 100%. | |
| 2463 // | |
| 2464 // Note that _SpinDuration is volatile, but we update it without locks | |
| 2465 // or atomics. The code is designed so that _SpinDuration stays within | |
| 2466 // a reasonable range even in the presence of races. The arithmetic | |
| 2467 // operations on _SpinDuration are closed over the domain of legal values, | |
| 2468 // so at worst a race will install and older but still legal value. | |
| 2469 // At the very worst this introduces some apparent non-determinism. | |
| 2470 // We might spin when we shouldn't or vice-versa, but since the spin | |
| 2471 // count are relatively short, even in the worst case, the effect is harmless. | |
| 2472 // | |
| 2473 // Care must be taken that a low "D" value does not become an | |
| 2474 // an absorbing state. Transient spinning failures -- when spinning | |
| 2475 // is overall profitable -- should not cause the system to converge | |
| 2476 // on low "D" values. We want spinning to be stable and predictable | |
| 2477 // and fairly responsive to change and at the same time we don't want | |
| 2478 // it to oscillate, become metastable, be "too" non-deterministic, | |
| 2479 // or converge on or enter undesirable stable absorbing states. | |
| 2480 // | |
| 2481 // We implement a feedback-based control system -- using past behavior | |
| 2482 // to predict future behavior. We face two issues: (a) if the | |
| 2483 // input signal is random then the spin predictor won't provide optimal | |
| 2484 // results, and (b) if the signal frequency is too high then the control | |
| 2485 // system, which has some natural response lag, will "chase" the signal. | |
| 2486 // (b) can arise from multimodal lock hold times. Transient preemption | |
| 2487 // can also result in apparent bimodal lock hold times. | |
| 2488 // Although sub-optimal, neither condition is particularly harmful, as | |
| 2489 // in the worst-case we'll spin when we shouldn't or vice-versa. | |
| 2490 // The maximum spin duration is rather short so the failure modes aren't bad. | |
| 2491 // To be conservative, I've tuned the gain in system to bias toward | |
| 2492 // _not spinning. Relatedly, the system can sometimes enter a mode where it | |
| 2493 // "rings" or oscillates between spinning and not spinning. This happens | |
| 2494 // when spinning is just on the cusp of profitability, however, so the | |
| 2495 // situation is not dire. The state is benign -- there's no need to add | |
| 2496 // hysteresis control to damp the transition rate between spinning and | |
| 2497 // not spinning. | |
| 2498 // | |
| 2499 // - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - - | |
| 2500 // | |
| 2501 // Spin-then-block strategies ... | |
| 2502 // | |
| 2503 // Thoughts on ways to improve spinning : | |
| 2504 // | |
| 2505 // * Periodically call {psr_}getloadavg() while spinning, and | |
| 2506 // permit unbounded spinning if the load average is < | |
| 2507 // the number of processors. Beware, however, that getloadavg() | |
| 2508 // is exceptionally fast on solaris (about 1/10 the cost of a full | |
| 2509 // spin cycle, but quite expensive on linux. Beware also, that | |
| 2510 // multiple JVMs could "ring" or oscillate in a feedback loop. | |
| 2511 // Sufficient damping would solve that problem. | |
| 2512 // | |
| 2513 // * We currently use spin loops with iteration counters to approximate | |
| 2514 // spinning for some interval. Given the availability of high-precision | |
| 2515 // time sources such as gethrtime(), %TICK, %STICK, RDTSC, etc., we should | |
| 2516 // someday reimplement the spin loops to duration-based instead of iteration-based. | |
| 2517 // | |
| 2518 // * Don't spin if there are more than N = (CPUs/2) threads | |
| 2519 // currently spinning on the monitor (or globally). | |
| 2520 // That is, limit the number of concurrent spinners. | |
| 2521 // We might also limit the # of spinners in the JVM, globally. | |
| 2522 // | |
| 2523 // * If a spinning thread observes _owner change hands it should | |
| 2524 // abort the spin (and park immediately) or at least debit | |
| 2525 // the spin counter by a large "penalty". | |
| 2526 // | |
| 2527 // * Classically, the spin count is either K*(CPUs-1) or is a | |
| 2528 // simple constant that approximates the length of a context switch. | |
| 2529 // We currently use a value -- computed by a special utility -- that | |
| 2530 // approximates round-trip context switch times. | |
| 2531 // | |
| 2532 // * Normally schedctl_start()/_stop() is used to advise the kernel | |
| 2533 // to avoid preempting threads that are running in short, bounded | |
| 2534 // critical sections. We could use the schedctl hooks in an inverted | |
| 2535 // sense -- spinners would set the nopreempt flag, but poll the preempt | |
| 2536 // pending flag. If a spinner observed a pending preemption it'd immediately | |
| 2537 // abort the spin and park. As such, the schedctl service acts as | |
| 2538 // a preemption warning mechanism. | |
| 2539 // | |
| 2540 // * In lieu of spinning, if the system is running below saturation | |
| 2541 // (that is, loadavg() << #cpus), we can instead suppress futile | |
| 2542 // wakeup throttling, or even wake more than one successor at exit-time. | |
| 2543 // The net effect is largely equivalent to spinning. In both cases, | |
| 2544 // contending threads go ONPROC and opportunistically attempt to acquire | |
| 2545 // the lock, decreasing lock handover latency at the expense of wasted | |
| 2546 // cycles and context switching. | |
| 2547 // | |
| 2548 // * We might to spin less after we've parked as the thread will | |
| 2549 // have less $ and TLB affinity with the processor. | |
| 2550 // Likewise, we might spin less if we come ONPROC on a different | |
| 2551 // processor or after a long period (>> rechose_interval). | |
| 2552 // | |
| 2553 // * A table-driven state machine similar to Solaris' dispadmin scheduling | |
| 2554 // tables might be a better design. Instead of encoding information in | |
| 2555 // _SpinDuration, _SpinFreq and _SpinClock we'd just use explicit, | |
| 2556 // discrete states. Success or failure during a spin would drive | |
| 2557 // state transitions, and each state node would contain a spin count. | |
| 2558 // | |
| 2559 // * If the processor is operating in a mode intended to conserve power | |
| 2560 // (such as Intel's SpeedStep) or to reduce thermal output (thermal | |
| 2561 // step-down mode) then the Java synchronization subsystem should | |
| 2562 // forgo spinning. | |
| 2563 // | |
| 2564 // * The minimum spin duration should be approximately the worst-case | |
| 2565 // store propagation latency on the platform. That is, the time | |
| 2566 // it takes a store on CPU A to become visible on CPU B, where A and | |
| 2567 // B are "distant". | |
| 2568 // | |
| 2569 // * We might want to factor a thread's priority in the spin policy. | |
| 2570 // Threads with a higher priority might spin for slightly longer. | |
| 2571 // Similarly, if we use back-off in the TATAS loop, lower priority | |
| 2572 // threads might back-off longer. We don't currently use a | |
| 2573 // thread's priority when placing it on the entry queue. We may | |
| 2574 // want to consider doing so in future releases. | |
| 2575 // | |
| 2576 // * We might transiently drop a thread's scheduling priority while it spins. | |
| 2577 // SCHED_BATCH on linux and FX scheduling class at priority=0 on Solaris | |
| 2578 // would suffice. We could even consider letting the thread spin indefinitely at | |
| 2579 // a depressed or "idle" priority. This brings up fairness issues, however -- | |
| 2580 // in a saturated system a thread would with a reduced priority could languish | |
| 2581 // for extended periods on the ready queue. | |
| 2582 // | |
| 2583 // * While spinning try to use the otherwise wasted time to help the VM make | |
| 2584 // progress: | |
| 2585 // | |
| 2586 // -- YieldTo() the owner, if the owner is OFFPROC but ready | |
| 2587 // Done our remaining quantum directly to the ready thread. | |
| 2588 // This helps "push" the lock owner through the critical section. | |
| 2589 // It also tends to improve affinity/locality as the lock | |
| 2590 // "migrates" less frequently between CPUs. | |
| 2591 // -- Walk our own stack in anticipation of blocking. Memoize the roots. | |
| 2592 // -- Perform strand checking for other thread. Unpark potential strandees. | |
| 2593 // -- Help GC: trace or mark -- this would need to be a bounded unit of work. | |
| 2594 // Unfortunately this will pollute our $ and TLBs. Recall that we | |
| 2595 // spin to avoid context switching -- context switching has an | |
| 2596 // immediate cost in latency, a disruptive cost to other strands on a CMT | |
| 2597 // processor, and an amortized cost because of the D$ and TLB cache | |
| 2598 // reload transient when the thread comes back ONPROC and repopulates | |
| 2599 // $s and TLBs. | |
| 2600 // -- call getloadavg() to see if the system is saturated. It'd probably | |
| 2601 // make sense to call getloadavg() half way through the spin. | |
| 2602 // If the system isn't at full capacity the we'd simply reset | |
| 2603 // the spin counter to and extend the spin attempt. | |
| 2604 // -- Doug points out that we should use the same "helping" policy | |
| 2605 // in thread.yield(). | |
| 2606 // | |
| 2607 // * Try MONITOR-MWAIT on systems that support those instructions. | |
| 2608 // | |
| 2609 // * The spin statistics that drive spin decisions & frequency are | |
| 2610 // maintained in the objectmonitor structure so if we deflate and reinflate | |
| 2611 // we lose spin state. In practice this is not usually a concern | |
| 2612 // as the default spin state after inflation is aggressive (optimistic) | |
| 2613 // and tends toward spinning. So in the worst case for a lock where | |
| 2614 // spinning is not profitable we may spin unnecessarily for a brief | |
| 2615 // period. But then again, if a lock is contended it'll tend not to deflate | |
| 2616 // in the first place. | |
| 2617 | |
| 2618 | |
| 2619 intptr_t ObjectMonitor::SpinCallbackArgument = 0 ; | |
| 2620 int (*ObjectMonitor::SpinCallbackFunction)(intptr_t, int) = NULL ; | |
| 2621 | |
| 2622 // Spinning: Fixed frequency (100%), vary duration | |
| 2623 | |
| 2624 int ObjectMonitor::TrySpin_VaryDuration (Thread * Self) { | |
| 2625 | |
| 2626 // Dumb, brutal spin. Good for comparative measurements against adaptive spinning. | |
| 2627 int ctr = Knob_FixedSpin ; | |
| 2628 if (ctr != 0) { | |
| 2629 while (--ctr >= 0) { | |
| 2630 if (TryLock (Self) > 0) return 1 ; | |
| 2631 SpinPause () ; | |
| 2632 } | |
| 2633 return 0 ; | |
| 2634 } | |
| 2635 | |
| 2636 for (ctr = Knob_PreSpin + 1; --ctr >= 0 ; ) { | |
| 2637 if (TryLock(Self) > 0) { | |
| 2638 // Increase _SpinDuration ... | |
| 2639 // Note that we don't clamp SpinDuration precisely at SpinLimit. | |
| 2640 // Raising _SpurDuration to the poverty line is key. | |
| 2641 int x = _SpinDuration ; | |
| 2642 if (x < Knob_SpinLimit) { | |
| 2643 if (x < Knob_Poverty) x = Knob_Poverty ; | |
| 2644 _SpinDuration = x + Knob_BonusB ; | |
| 2645 } | |
| 2646 return 1 ; | |
| 2647 } | |
| 2648 SpinPause () ; | |
| 2649 } | |
| 2650 | |
| 2651 // Admission control - verify preconditions for spinning | |
| 2652 // | |
| 2653 // We always spin a little bit, just to prevent _SpinDuration == 0 from | |
| 2654 // becoming an absorbing state. Put another way, we spin briefly to | |
| 2655 // sample, just in case the system load, parallelism, contention, or lock | |
| 2656 // modality changed. | |
| 2657 // | |
| 2658 // Consider the following alternative: | |
| 2659 // Periodically set _SpinDuration = _SpinLimit and try a long/full | |
| 2660 // spin attempt. "Periodically" might mean after a tally of | |
| 2661 // the # of failed spin attempts (or iterations) reaches some threshold. | |
| 2662 // This takes us into the realm of 1-out-of-N spinning, where we | |
| 2663 // hold the duration constant but vary the frequency. | |
| 2664 | |
| 2665 ctr = _SpinDuration ; | |
| 2666 if (ctr < Knob_SpinBase) ctr = Knob_SpinBase ; | |
| 2667 if (ctr <= 0) return 0 ; | |
| 2668 | |
| 2669 if (Knob_SuccRestrict && _succ != NULL) return 0 ; | |
| 2670 if (Knob_OState && NotRunnable (Self, (Thread *) _owner)) { | |
| 2671 TEVENT (Spin abort - notrunnable [TOP]); | |
| 2672 return 0 ; | |
| 2673 } | |
| 2674 | |
| 2675 int MaxSpin = Knob_MaxSpinners ; | |
| 2676 if (MaxSpin >= 0) { | |
| 2677 if (_Spinner > MaxSpin) { | |
| 2678 TEVENT (Spin abort -- too many spinners) ; | |
| 2679 return 0 ; | |
| 2680 } | |
| 2681 // Slighty racy, but benign ... | |
| 2682 Adjust (&_Spinner, 1) ; | |
| 2683 } | |
| 2684 | |
| 2685 // We're good to spin ... spin ingress. | |
| 2686 // CONSIDER: use Prefetch::write() to avoid RTS->RTO upgrades | |
| 2687 // when preparing to LD...CAS _owner, etc and the CAS is likely | |
| 2688 // to succeed. | |
| 2689 int hits = 0 ; | |
| 2690 int msk = 0 ; | |
| 2691 int caspty = Knob_CASPenalty ; | |
| 2692 int oxpty = Knob_OXPenalty ; | |
| 2693 int sss = Knob_SpinSetSucc ; | |
| 2694 if (sss && _succ == NULL ) _succ = Self ; | |
| 2695 Thread * prv = NULL ; | |
| 2696 | |
| 2697 // There are three ways to exit the following loop: | |
| 2698 // 1. A successful spin where this thread has acquired the lock. | |
| 2699 // 2. Spin failure with prejudice | |
| 2700 // 3. Spin failure without prejudice | |
| 2701 | |
| 2702 while (--ctr >= 0) { | |
| 2703 | |
| 2704 // Periodic polling -- Check for pending GC | |
| 2705 // Threads may spin while they're unsafe. | |
| 2706 // We don't want spinning threads to delay the JVM from reaching | |
| 2707 // a stop-the-world safepoint or to steal cycles from GC. | |
| 2708 // If we detect a pending safepoint we abort in order that | |
| 2709 // (a) this thread, if unsafe, doesn't delay the safepoint, and (b) | |
| 2710 // this thread, if safe, doesn't steal cycles from GC. | |
| 2711 // This is in keeping with the "no loitering in runtime" rule. | |
| 2712 // We periodically check to see if there's a safepoint pending. | |
| 2713 if ((ctr & 0xFF) == 0) { | |
| 2714 if (SafepointSynchronize::do_call_back()) { | |
| 2715 TEVENT (Spin: safepoint) ; | |
| 2716 goto Abort ; // abrupt spin egress | |
| 2717 } | |
| 2718 if (Knob_UsePause & 1) SpinPause () ; | |
| 2719 | |
| 2720 int (*scb)(intptr_t,int) = SpinCallbackFunction ; | |
| 2721 if (hits > 50 && scb != NULL) { | |
| 2722 int abend = (*scb)(SpinCallbackArgument, 0) ; | |
| 2723 } | |
| 2724 } | |
| 2725 | |
| 2726 if (Knob_UsePause & 2) SpinPause() ; | |
| 2727 | |
| 2728 // Exponential back-off ... Stay off the bus to reduce coherency traffic. | |
| 2729 // This is useful on classic SMP systems, but is of less utility on | |
| 2730 // N1-style CMT platforms. | |
| 2731 // | |
| 2732 // Trade-off: lock acquisition latency vs coherency bandwidth. | |
| 2733 // Lock hold times are typically short. A histogram | |
| 2734 // of successful spin attempts shows that we usually acquire | |
| 2735 // the lock early in the spin. That suggests we want to | |
| 2736 // sample _owner frequently in the early phase of the spin, | |
| 2737 // but then back-off and sample less frequently as the spin | |
| 2738 // progresses. The back-off makes a good citizen on SMP big | |
| 2739 // SMP systems. Oversampling _owner can consume excessive | |
| 2740 // coherency bandwidth. Relatedly, if we _oversample _owner we | |
| 2741 // can inadvertently interfere with the the ST m->owner=null. | |
| 2742 // executed by the lock owner. | |
| 2743 if (ctr & msk) continue ; | |
| 2744 ++hits ; | |
| 2745 if ((hits & 0xF) == 0) { | |
| 2746 // The 0xF, above, corresponds to the exponent. | |
| 2747 // Consider: (msk+1)|msk | |
| 2748 msk = ((msk << 2)|3) & BackOffMask ; | |
| 2749 } | |
| 2750 | |
| 2751 // Probe _owner with TATAS | |
| 2752 // If this thread observes the monitor transition or flicker | |
| 2753 // from locked to unlocked to locked, then the odds that this | |
| 2754 // thread will acquire the lock in this spin attempt go down | |
| 2755 // considerably. The same argument applies if the CAS fails | |
| 2756 // or if we observe _owner change from one non-null value to | |
| 2757 // another non-null value. In such cases we might abort | |
| 2758 // the spin without prejudice or apply a "penalty" to the | |
| 2759 // spin count-down variable "ctr", reducing it by 100, say. | |
| 2760 | |
| 2761 Thread * ox = (Thread *) _owner ; | |
| 2762 if (ox == NULL) { | |
| 2763 ox = (Thread *) Atomic::cmpxchg_ptr (Self, &_owner, NULL) ; | |
| 2764 if (ox == NULL) { | |
| 2765 // The CAS succeeded -- this thread acquired ownership | |
| 2766 // Take care of some bookkeeping to exit spin state. | |
| 2767 if (sss && _succ == Self) { | |
| 2768 _succ = NULL ; | |
| 2769 } | |
| 2770 if (MaxSpin > 0) Adjust (&_Spinner, -1) ; | |
| 2771 | |
| 2772 // Increase _SpinDuration : | |
| 2773 // The spin was successful (profitable) so we tend toward | |
| 2774 // longer spin attempts in the future. | |
| 2775 // CONSIDER: factor "ctr" into the _SpinDuration adjustment. | |
| 2776 // If we acquired the lock early in the spin cycle it | |
| 2777 // makes sense to increase _SpinDuration proportionally. | |
| 2778 // Note that we don't clamp SpinDuration precisely at SpinLimit. | |
| 2779 int x = _SpinDuration ; | |
| 2780 if (x < Knob_SpinLimit) { | |
| 2781 if (x < Knob_Poverty) x = Knob_Poverty ; | |
| 2782 _SpinDuration = x + Knob_Bonus ; | |
| 2783 } | |
| 2784 return 1 ; | |
| 2785 } | |
| 2786 | |
| 2787 // The CAS failed ... we can take any of the following actions: | |
| 2788 // * penalize: ctr -= Knob_CASPenalty | |
| 2789 // * exit spin with prejudice -- goto Abort; | |
| 2790 // * exit spin without prejudice. | |
| 2791 // * Since CAS is high-latency, retry again immediately. | |
| 2792 prv = ox ; | |
| 2793 TEVENT (Spin: cas failed) ; | |
| 2794 if (caspty == -2) break ; | |
| 2795 if (caspty == -1) goto Abort ; | |
| 2796 ctr -= caspty ; | |
| 2797 continue ; | |
| 2798 } | |
| 2799 | |
| 2800 // Did lock ownership change hands ? | |
| 2801 if (ox != prv && prv != NULL ) { | |
| 2802 TEVENT (spin: Owner changed) | |
| 2803 if (oxpty == -2) break ; | |
| 2804 if (oxpty == -1) goto Abort ; | |
| 2805 ctr -= oxpty ; | |
| 2806 } | |
| 2807 prv = ox ; | |
| 2808 | |
| 2809 // Abort the spin if the owner is not executing. | |
| 2810 // The owner must be executing in order to drop the lock. | |
| 2811 // Spinning while the owner is OFFPROC is idiocy. | |
| 2812 // Consider: ctr -= RunnablePenalty ; | |
| 2813 if (Knob_OState && NotRunnable (Self, ox)) { | |
| 2814 TEVENT (Spin abort - notrunnable); | |
| 2815 goto Abort ; | |
| 2816 } | |
| 2817 if (sss && _succ == NULL ) _succ = Self ; | |
| 2818 } | |
| 2819 | |
| 2820 // Spin failed with prejudice -- reduce _SpinDuration. | |
| 2821 // TODO: Use an AIMD-like policy to adjust _SpinDuration. | |
| 2822 // AIMD is globally stable. | |
| 2823 TEVENT (Spin failure) ; | |
| 2824 { | |
| 2825 int x = _SpinDuration ; | |
| 2826 if (x > 0) { | |
| 2827 // Consider an AIMD scheme like: x -= (x >> 3) + 100 | |
| 2828 // This is globally sample and tends to damp the response. | |
| 2829 x -= Knob_Penalty ; | |
| 2830 if (x < 0) x = 0 ; | |
| 2831 _SpinDuration = x ; | |
| 2832 } | |
| 2833 } | |
| 2834 | |
| 2835 Abort: | |
| 2836 if (MaxSpin >= 0) Adjust (&_Spinner, -1) ; | |
| 2837 if (sss && _succ == Self) { | |
| 2838 _succ = NULL ; | |
| 2839 // Invariant: after setting succ=null a contending thread | |
| 2840 // must recheck-retry _owner before parking. This usually happens | |
| 2841 // in the normal usage of TrySpin(), but it's safest | |
| 2842 // to make TrySpin() as foolproof as possible. | |
| 2843 OrderAccess::fence() ; | |
| 2844 if (TryLock(Self) > 0) return 1 ; | |
| 2845 } | |
| 2846 return 0 ; | |
| 2847 } | |
| 2848 | |
| 2849 #define TrySpin TrySpin_VaryDuration | |
| 2850 | |
| 2851 static void DeferredInitialize () { | |
| 2852 if (InitDone > 0) return ; | |
| 2853 if (Atomic::cmpxchg (-1, &InitDone, 0) != 0) { | |
| 2854 while (InitDone != 1) ; | |
| 2855 return ; | |
| 2856 } | |
| 2857 | |
| 2858 // One-shot global initialization ... | |
| 2859 // The initialization is idempotent, so we don't need locks. | |
| 2860 // In the future consider doing this via os::init_2(). | |
| 2861 // SyncKnobs consist of <Key>=<Value> pairs in the style | |
| 2862 // of environment variables. Start by converting ':' to NUL. | |
| 2863 | |
| 2864 if (SyncKnobs == NULL) SyncKnobs = "" ; | |
| 2865 | |
| 2866 size_t sz = strlen (SyncKnobs) ; | |
| 2867 char * knobs = (char *) malloc (sz + 2) ; | |
| 2868 if (knobs == NULL) { | |
| 2869 vm_exit_out_of_memory (sz + 2, "Parse SyncKnobs") ; | |
| 2870 guarantee (0, "invariant") ; | |
| 2871 } | |
| 2872 strcpy (knobs, SyncKnobs) ; | |
| 2873 knobs[sz+1] = 0 ; | |
| 2874 for (char * p = knobs ; *p ; p++) { | |
| 2875 if (*p == ':') *p = 0 ; | |
| 2876 } | |
| 2877 | |
| 2878 #define SETKNOB(x) { Knob_##x = kvGetInt (knobs, #x, Knob_##x); } | |
| 2879 SETKNOB(ReportSettings) ; | |
| 2880 SETKNOB(Verbose) ; | |
| 2881 SETKNOB(FixedSpin) ; | |
| 2882 SETKNOB(SpinLimit) ; | |
| 2883 SETKNOB(SpinBase) ; | |
| 2884 SETKNOB(SpinBackOff); | |
| 2885 SETKNOB(CASPenalty) ; | |
| 2886 SETKNOB(OXPenalty) ; | |
| 2887 SETKNOB(LogSpins) ; | |
| 2888 SETKNOB(SpinSetSucc) ; | |
| 2889 SETKNOB(SuccEnabled) ; | |
| 2890 SETKNOB(SuccRestrict) ; | |
| 2891 SETKNOB(Penalty) ; | |
| 2892 SETKNOB(Bonus) ; | |
| 2893 SETKNOB(BonusB) ; | |
| 2894 SETKNOB(Poverty) ; | |
| 2895 SETKNOB(SpinAfterFutile) ; | |
| 2896 SETKNOB(UsePause) ; | |
| 2897 SETKNOB(SpinEarly) ; | |
| 2898 SETKNOB(OState) ; | |
| 2899 SETKNOB(MaxSpinners) ; | |
| 2900 SETKNOB(PreSpin) ; | |
| 2901 SETKNOB(ExitPolicy) ; | |
| 2902 SETKNOB(QMode); | |
| 2903 SETKNOB(ResetEvent) ; | |
| 2904 SETKNOB(MoveNotifyee) ; | |
| 2905 SETKNOB(FastHSSEC) ; | |
| 2906 #undef SETKNOB | |
| 2907 | |
| 2908 if (os::is_MP()) { | |
| 2909 BackOffMask = (1 << Knob_SpinBackOff) - 1 ; | |
| 2910 if (Knob_ReportSettings) ::printf ("BackOffMask=%X\n", BackOffMask) ; | |
| 2911 // CONSIDER: BackOffMask = ROUNDUP_NEXT_POWER2 (ncpus-1) | |
| 2912 } else { | |
| 2913 Knob_SpinLimit = 0 ; | |
| 2914 Knob_SpinBase = 0 ; | |
| 2915 Knob_PreSpin = 0 ; | |
| 2916 Knob_FixedSpin = -1 ; | |
| 2917 } | |
| 2918 | |
| 2919 if (Knob_LogSpins == 0) { | |
| 2920 ObjectSynchronizer::_sync_FailedSpins = NULL ; | |
| 2921 } | |
| 2922 | |
| 2923 free (knobs) ; | |
| 2924 OrderAccess::fence() ; | |
| 2925 InitDone = 1 ; | |
| 2926 } | |
| 2927 | |
| 2928 // Theory of operations -- Monitors lists, thread residency, etc: | |
| 2929 // | |
| 2930 // * A thread acquires ownership of a monitor by successfully | |
| 2931 // CAS()ing the _owner field from null to non-null. | |
| 2932 // | |
| 2933 // * Invariant: A thread appears on at most one monitor list -- | |
| 2934 // cxq, EntryList or WaitSet -- at any one time. | |
| 2935 // | |
| 2936 // * Contending threads "push" themselves onto the cxq with CAS | |
| 2937 // and then spin/park. | |
| 2938 // | |
| 2939 // * After a contending thread eventually acquires the lock it must | |
| 2940 // dequeue itself from either the EntryList or the cxq. | |
| 2941 // | |
| 2942 // * The exiting thread identifies and unparks an "heir presumptive" | |
| 2943 // tentative successor thread on the EntryList. Critically, the | |
| 2944 // exiting thread doesn't unlink the successor thread from the EntryList. | |
| 2945 // After having been unparked, the wakee will recontend for ownership of | |
| 2946 // the monitor. The successor (wakee) will either acquire the lock or | |
| 2947 // re-park itself. | |
| 2948 // | |
| 2949 // Succession is provided for by a policy of competitive handoff. | |
| 2950 // The exiting thread does _not_ grant or pass ownership to the | |
| 2951 // successor thread. (This is also referred to as "handoff" succession"). | |
| 2952 // Instead the exiting thread releases ownership and possibly wakes | |
| 2953 // a successor, so the successor can (re)compete for ownership of the lock. | |
| 2954 // If the EntryList is empty but the cxq is populated the exiting | |
| 2955 // thread will drain the cxq into the EntryList. It does so by | |
| 2956 // by detaching the cxq (installing null with CAS) and folding | |
| 2957 // the threads from the cxq into the EntryList. The EntryList is | |
| 2958 // doubly linked, while the cxq is singly linked because of the | |
| 2959 // CAS-based "push" used to enqueue recently arrived threads (RATs). | |
| 2960 // | |
| 2961 // * Concurrency invariants: | |
| 2962 // | |
| 2963 // -- only the monitor owner may access or mutate the EntryList. | |
| 2964 // The mutex property of the monitor itself protects the EntryList | |
| 2965 // from concurrent interference. | |
| 2966 // -- Only the monitor owner may detach the cxq. | |
| 2967 // | |
| 2968 // * The monitor entry list operations avoid locks, but strictly speaking | |
| 2969 // they're not lock-free. Enter is lock-free, exit is not. | |
| 2970 // See http://j2se.east/~dice/PERSIST/040825-LockFreeQueues.html | |
| 2971 // | |
| 2972 // * The cxq can have multiple concurrent "pushers" but only one concurrent | |
| 2973 // detaching thread. This mechanism is immune from the ABA corruption. | |
| 2974 // More precisely, the CAS-based "push" onto cxq is ABA-oblivious. | |
| 2975 // | |
| 2976 // * Taken together, the cxq and the EntryList constitute or form a | |
| 2977 // single logical queue of threads stalled trying to acquire the lock. | |
| 2978 // We use two distinct lists to improve the odds of a constant-time | |
| 2979 // dequeue operation after acquisition (in the ::enter() epilog) and | |
| 2980 // to reduce heat on the list ends. (c.f. Michael Scott's "2Q" algorithm). | |
| 2981 // A key desideratum is to minimize queue & monitor metadata manipulation | |
| 2982 // that occurs while holding the monitor lock -- that is, we want to | |
| 2983 // minimize monitor lock holds times. Note that even a small amount of | |
| 2984 // fixed spinning will greatly reduce the # of enqueue-dequeue operations | |
| 2985 // on EntryList|cxq. That is, spinning relieves contention on the "inner" | |
| 2986 // locks and monitor metadata. | |
| 2987 // | |
| 2988 // Cxq points to the the set of Recently Arrived Threads attempting entry. | |
| 2989 // Because we push threads onto _cxq with CAS, the RATs must take the form of | |
| 2990 // a singly-linked LIFO. We drain _cxq into EntryList at unlock-time when | |
| 2991 // the unlocking thread notices that EntryList is null but _cxq is != null. | |
| 2992 // | |
| 2993 // The EntryList is ordered by the prevailing queue discipline and | |
| 2994 // can be organized in any convenient fashion, such as a doubly-linked list or | |
| 2995 // a circular doubly-linked list. Critically, we want insert and delete operations | |
| 2996 // to operate in constant-time. If we need a priority queue then something akin | |
| 2997 // to Solaris' sleepq would work nicely. Viz., | |
| 2998 // http://agg.eng/ws/on10_nightly/source/usr/src/uts/common/os/sleepq.c. | |
| 2999 // Queue discipline is enforced at ::exit() time, when the unlocking thread | |
| 3000 // drains the cxq into the EntryList, and orders or reorders the threads on the | |
| 3001 // EntryList accordingly. | |
| 3002 // | |
| 3003 // Barring "lock barging", this mechanism provides fair cyclic ordering, | |
| 3004 // somewhat similar to an elevator-scan. | |
| 3005 // | |
| 3006 // * The monitor synchronization subsystem avoids the use of native | |
| 3007 // synchronization primitives except for the narrow platform-specific | |
| 3008 // park-unpark abstraction. See the comments in os_solaris.cpp regarding | |
| 3009 // the semantics of park-unpark. Put another way, this monitor implementation | |
| 3010 // depends only on atomic operations and park-unpark. The monitor subsystem | |
| 3011 // manages all RUNNING->BLOCKED and BLOCKED->READY transitions while the | |
| 3012 // underlying OS manages the READY<->RUN transitions. | |
| 3013 // | |
| 3014 // * Waiting threads reside on the WaitSet list -- wait() puts | |
| 3015 // the caller onto the WaitSet. | |
| 3016 // | |
| 3017 // * notify() or notifyAll() simply transfers threads from the WaitSet to | |
| 3018 // either the EntryList or cxq. Subsequent exit() operations will | |
| 3019 // unpark the notifyee. Unparking a notifee in notify() is inefficient - | |
| 3020 // it's likely the notifyee would simply impale itself on the lock held | |
| 3021 // by the notifier. | |
| 3022 // | |
| 3023 // * An interesting alternative is to encode cxq as (List,LockByte) where | |
| 3024 // the LockByte is 0 iff the monitor is owned. _owner is simply an auxiliary | |
| 3025 // variable, like _recursions, in the scheme. The threads or Events that form | |
| 3026 // the list would have to be aligned in 256-byte addresses. A thread would | |
| 3027 // try to acquire the lock or enqueue itself with CAS, but exiting threads | |
| 3028 // could use a 1-0 protocol and simply STB to set the LockByte to 0. | |
| 3029 // Note that is is *not* word-tearing, but it does presume that full-word | |
| 3030 // CAS operations are coherent with intermix with STB operations. That's true | |
| 3031 // on most common processors. | |
| 3032 // | |
| 3033 // * See also http://blogs.sun.com/dave | |
| 3034 | |
| 3035 | |
| 3036 void ATTR ObjectMonitor::EnterI (TRAPS) { | |
| 3037 Thread * Self = THREAD ; | |
| 3038 assert (Self->is_Java_thread(), "invariant") ; | |
| 3039 assert (((JavaThread *) Self)->thread_state() == _thread_blocked , "invariant") ; | |
| 3040 | |
| 3041 // Try the lock - TATAS | |
| 3042 if (TryLock (Self) > 0) { | |
| 3043 assert (_succ != Self , "invariant") ; | |
| 3044 assert (_owner == Self , "invariant") ; | |
| 3045 assert (_Responsible != Self , "invariant") ; | |
| 3046 return ; | |
| 3047 } | |
| 3048 | |
| 3049 DeferredInitialize () ; | |
| 3050 | |
| 3051 // We try one round of spinning *before* enqueueing Self. | |
| 3052 // | |
| 3053 // If the _owner is ready but OFFPROC we could use a YieldTo() | |
| 3054 // operation to donate the remainder of this thread's quantum | |
| 3055 // to the owner. This has subtle but beneficial affinity | |
| 3056 // effects. | |
| 3057 | |
| 3058 if (TrySpin (Self) > 0) { | |
| 3059 assert (_owner == Self , "invariant") ; | |
| 3060 assert (_succ != Self , "invariant") ; | |
| 3061 assert (_Responsible != Self , "invariant") ; | |
| 3062 return ; | |
| 3063 } | |
| 3064 | |
| 3065 // The Spin failed -- Enqueue and park the thread ... | |
| 3066 assert (_succ != Self , "invariant") ; | |
| 3067 assert (_owner != Self , "invariant") ; | |
| 3068 assert (_Responsible != Self , "invariant") ; | |
| 3069 | |
| 3070 // Enqueue "Self" on ObjectMonitor's _cxq. | |
| 3071 // | |
| 3072 // Node acts as a proxy for Self. | |
| 3073 // As an aside, if were to ever rewrite the synchronization code mostly | |
| 3074 // in Java, WaitNodes, ObjectMonitors, and Events would become 1st-class | |
| 3075 // Java objects. This would avoid awkward lifecycle and liveness issues, | |
| 3076 // as well as eliminate a subset of ABA issues. | |
| 3077 // TODO: eliminate ObjectWaiter and enqueue either Threads or Events. | |
| 3078 // | |
| 3079 | |
| 3080 ObjectWaiter node(Self) ; | |
| 3081 Self->_ParkEvent->reset() ; | |
| 3082 node._prev = (ObjectWaiter *) 0xBAD ; | |
| 3083 node.TState = ObjectWaiter::TS_CXQ ; | |
| 3084 | |
| 3085 // Push "Self" onto the front of the _cxq. | |
| 3086 // Once on cxq/EntryList, Self stays on-queue until it acquires the lock. | |
| 3087 // Note that spinning tends to reduce the rate at which threads | |
| 3088 // enqueue and dequeue on EntryList|cxq. | |
| 3089 ObjectWaiter * nxt ; | |
| 3090 for (;;) { | |
| 3091 node._next = nxt = _cxq ; | |
| 3092 if (Atomic::cmpxchg_ptr (&node, &_cxq, nxt) == nxt) break ; | |
| 3093 | |
| 3094 // Interference - the CAS failed because _cxq changed. Just retry. | |
| 3095 // As an optional optimization we retry the lock. | |
| 3096 if (TryLock (Self) > 0) { | |
| 3097 assert (_succ != Self , "invariant") ; | |
| 3098 assert (_owner == Self , "invariant") ; | |
| 3099 assert (_Responsible != Self , "invariant") ; | |
| 3100 return ; | |
| 3101 } | |
| 3102 } | |
| 3103 | |
| 3104 // Check for cxq|EntryList edge transition to non-null. This indicates | |
| 3105 // the onset of contention. While contention persists exiting threads | |
| 3106 // will use a ST:MEMBAR:LD 1-1 exit protocol. When contention abates exit | |
| 3107 // operations revert to the faster 1-0 mode. This enter operation may interleave | |
| 3108 // (race) a concurrent 1-0 exit operation, resulting in stranding, so we | |
| 3109 // arrange for one of the contending thread to use a timed park() operations | |
| 3110 // to detect and recover from the race. (Stranding is form of progress failure | |
| 3111 // where the monitor is unlocked but all the contending threads remain parked). | |
| 3112 // That is, at least one of the contended threads will periodically poll _owner. | |
| 3113 // One of the contending threads will become the designated "Responsible" thread. | |
| 3114 // The Responsible thread uses a timed park instead of a normal indefinite park | |
| 3115 // operation -- it periodically wakes and checks for and recovers from potential | |
| 3116 // strandings admitted by 1-0 exit operations. We need at most one Responsible | |
| 3117 // thread per-monitor at any given moment. Only threads on cxq|EntryList may | |
| 3118 // be responsible for a monitor. | |
| 3119 // | |
| 3120 // Currently, one of the contended threads takes on the added role of "Responsible". | |
| 3121 // A viable alternative would be to use a dedicated "stranding checker" thread | |
| 3122 // that periodically iterated over all the threads (or active monitors) and unparked | |
| 3123 // successors where there was risk of stranding. This would help eliminate the | |
| 3124 // timer scalability issues we see on some platforms as we'd only have one thread | |
| 3125 // -- the checker -- parked on a timer. | |
| 3126 | |
| 3127 if ((SyncFlags & 16) == 0 && nxt == NULL && _EntryList == NULL) { | |
| 3128 // Try to assume the role of responsible thread for the monitor. | |
| 3129 // CONSIDER: ST vs CAS vs { if (Responsible==null) Responsible=Self } | |
| 3130 Atomic::cmpxchg_ptr (Self, &_Responsible, NULL) ; | |
| 3131 } | |
| 3132 | |
| 3133 // The lock have been released while this thread was occupied queueing | |
| 3134 // itself onto _cxq. To close the race and avoid "stranding" and | |
| 3135 // progress-liveness failure we must resample-retry _owner before parking. | |
| 3136 // Note the Dekker/Lamport duality: ST cxq; MEMBAR; LD Owner. | |
| 3137 // In this case the ST-MEMBAR is accomplished with CAS(). | |
| 3138 // | |
| 3139 // TODO: Defer all thread state transitions until park-time. | |
| 3140 // Since state transitions are heavy and inefficient we'd like | |
| 3141 // to defer the state transitions until absolutely necessary, | |
| 3142 // and in doing so avoid some transitions ... | |
| 3143 | |
| 3144 TEVENT (Inflated enter - Contention) ; | |
| 3145 int nWakeups = 0 ; | |
| 3146 int RecheckInterval = 1 ; | |
| 3147 | |
| 3148 for (;;) { | |
| 3149 | |
| 3150 if (TryLock (Self) > 0) break ; | |
| 3151 assert (_owner != Self, "invariant") ; | |
| 3152 | |
| 3153 if ((SyncFlags & 2) && _Responsible == NULL) { | |
| 3154 Atomic::cmpxchg_ptr (Self, &_Responsible, NULL) ; | |
| 3155 } | |
| 3156 | |
| 3157 // park self | |
| 3158 if (_Responsible == Self || (SyncFlags & 1)) { | |
| 3159 TEVENT (Inflated enter - park TIMED) ; | |
| 3160 Self->_ParkEvent->park ((jlong) RecheckInterval) ; | |
| 3161 // Increase the RecheckInterval, but clamp the value. | |
| 3162 RecheckInterval *= 8 ; | |
| 3163 if (RecheckInterval > 1000) RecheckInterval = 1000 ; | |
| 3164 } else { | |
| 3165 TEVENT (Inflated enter - park UNTIMED) ; | |
| 3166 Self->_ParkEvent->park() ; | |
| 3167 } | |
| 3168 | |
| 3169 if (TryLock(Self) > 0) break ; | |
| 3170 | |
| 3171 // The lock is still contested. | |
| 3172 // Keep a tally of the # of futile wakeups. | |
| 3173 // Note that the counter is not protected by a lock or updated by atomics. | |
| 3174 // That is by design - we trade "lossy" counters which are exposed to | |
| 3175 // races during updates for a lower probe effect. | |
| 3176 TEVENT (Inflated enter - Futile wakeup) ; | |
| 3177 if (ObjectSynchronizer::_sync_FutileWakeups != NULL) { | |
| 3178 ObjectSynchronizer::_sync_FutileWakeups->inc() ; | |
| 3179 } | |
| 3180 ++ nWakeups ; | |
| 3181 | |
| 3182 // Assuming this is not a spurious wakeup we'll normally find _succ == Self. | |
| 3183 // We can defer clearing _succ until after the spin completes | |
| 3184 // TrySpin() must tolerate being called with _succ == Self. | |
| 3185 // Try yet another round of adaptive spinning. | |
| 3186 if ((Knob_SpinAfterFutile & 1) && TrySpin (Self) > 0) break ; | |
| 3187 | |
| 3188 // We can find that we were unpark()ed and redesignated _succ while | |
| 3189 // we were spinning. That's harmless. If we iterate and call park(), | |
| 3190 // park() will consume the event and return immediately and we'll | |
| 3191 // just spin again. This pattern can repeat, leaving _succ to simply | |
| 3192 // spin on a CPU. Enable Knob_ResetEvent to clear pending unparks(). | |
| 3193 // Alternately, we can sample fired() here, and if set, forgo spinning | |
| 3194 // in the next iteration. | |
| 3195 | |
| 3196 if ((Knob_ResetEvent & 1) && Self->_ParkEvent->fired()) { | |
| 3197 Self->_ParkEvent->reset() ; | |
| 3198 OrderAccess::fence() ; | |
| 3199 } | |
| 3200 if (_succ == Self) _succ = NULL ; | |
| 3201 | |
| 3202 // Invariant: after clearing _succ a thread *must* retry _owner before parking. | |
| 3203 OrderAccess::fence() ; | |
| 3204 } | |
| 3205 | |
| 3206 // Egress : | |
| 3207 // Self has acquired the lock -- Unlink Self from the cxq or EntryList. | |
| 3208 // Normally we'll find Self on the EntryList . | |
| 3209 // From the perspective of the lock owner (this thread), the | |
| 3210 // EntryList is stable and cxq is prepend-only. | |
| 3211 // The head of cxq is volatile but the interior is stable. | |
| 3212 // In addition, Self.TState is stable. | |
| 3213 | |
| 3214 assert (_owner == Self , "invariant") ; | |
| 3215 assert (object() != NULL , "invariant") ; | |
| 3216 // I'd like to write: | |
| 3217 // guarantee (((oop)(object()))->mark() == markOopDesc::encode(this), "invariant") ; | |
| 3218 // but as we're at a safepoint that's not safe. | |
| 3219 | |
| 3220 UnlinkAfterAcquire (Self, &node) ; | |
| 3221 if (_succ == Self) _succ = NULL ; | |
| 3222 | |
| 3223 assert (_succ != Self, "invariant") ; | |
| 3224 if (_Responsible == Self) { | |
| 3225 _Responsible = NULL ; | |
| 3226 // Dekker pivot-point. | |
| 3227 // Consider OrderAccess::storeload() here | |
| 3228 | |
| 3229 // We may leave threads on cxq|EntryList without a designated | |
| 3230 // "Responsible" thread. This is benign. When this thread subsequently | |
| 3231 // exits the monitor it can "see" such preexisting "old" threads -- | |
| 3232 // threads that arrived on the cxq|EntryList before the fence, above -- | |
| 3233 // by LDing cxq|EntryList. Newly arrived threads -- that is, threads | |
| 3234 // that arrive on cxq after the ST:MEMBAR, above -- will set Responsible | |
| 3235 // non-null and elect a new "Responsible" timer thread. | |
| 3236 // | |
| 3237 // This thread executes: | |
| 3238 // ST Responsible=null; MEMBAR (in enter epilog - here) | |
| 3239 // LD cxq|EntryList (in subsequent exit) | |
| 3240 // | |
| 3241 // Entering threads in the slow/contended path execute: | |
| 3242 // ST cxq=nonnull; MEMBAR; LD Responsible (in enter prolog) | |
| 3243 // The (ST cxq; MEMBAR) is accomplished with CAS(). | |
| 3244 // | |
| 3245 // The MEMBAR, above, prevents the LD of cxq|EntryList in the subsequent | |
| 3246 // exit operation from floating above the ST Responsible=null. | |
| 3247 // | |
| 3248 // In *practice* however, EnterI() is always followed by some atomic | |
| 3249 // operation such as the decrement of _count in ::enter(). Those atomics | |
| 3250 // obviate the need for the explicit MEMBAR, above. | |
| 3251 } | |
| 3252 | |
| 3253 // We've acquired ownership with CAS(). | |
| 3254 // CAS is serializing -- it has MEMBAR/FENCE-equivalent semantics. | |
| 3255 // But since the CAS() this thread may have also stored into _succ, | |
| 3256 // EntryList, cxq or Responsible. These meta-data updates must be | |
| 3257 // visible __before this thread subsequently drops the lock. | |
| 3258 // Consider what could occur if we didn't enforce this constraint -- | |
| 3259 // STs to monitor meta-data and user-data could reorder with (become | |
| 3260 // visible after) the ST in exit that drops ownership of the lock. | |
| 3261 // Some other thread could then acquire the lock, but observe inconsistent | |
| 3262 // or old monitor meta-data and heap data. That violates the JMM. | |
| 3263 // To that end, the 1-0 exit() operation must have at least STST|LDST | |
| 3264 // "release" barrier semantics. Specifically, there must be at least a | |
| 3265 // STST|LDST barrier in exit() before the ST of null into _owner that drops | |
| 3266 // the lock. The barrier ensures that changes to monitor meta-data and data | |
| 3267 // protected by the lock will be visible before we release the lock, and | |
| 3268 // therefore before some other thread (CPU) has a chance to acquire the lock. | |
| 3269 // See also: http://gee.cs.oswego.edu/dl/jmm/cookbook.html. | |
| 3270 // | |
| 3271 // Critically, any prior STs to _succ or EntryList must be visible before | |
| 3272 // the ST of null into _owner in the *subsequent* (following) corresponding | |
| 3273 // monitorexit. Recall too, that in 1-0 mode monitorexit does not necessarily | |
| 3274 // execute a serializing instruction. | |
| 3275 | |
| 3276 if (SyncFlags & 8) { | |
| 3277 OrderAccess::fence() ; | |
| 3278 } | |
| 3279 return ; | |
| 3280 } | |
| 3281 | |
| 3282 // ExitSuspendEquivalent: | |
| 3283 // A faster alternate to handle_special_suspend_equivalent_condition() | |
| 3284 // | |
| 3285 // handle_special_suspend_equivalent_condition() unconditionally | |
| 3286 // acquires the SR_lock. On some platforms uncontended MutexLocker() | |
| 3287 // operations have high latency. Note that in ::enter() we call HSSEC | |
| 3288 // while holding the monitor, so we effectively lengthen the critical sections. | |
| 3289 // | |
| 3290 // There are a number of possible solutions: | |
| 3291 // | |
| 3292 // A. To ameliorate the problem we might also defer state transitions | |
| 3293 // to as late as possible -- just prior to parking. | |
| 3294 // Given that, we'd call HSSEC after having returned from park(), | |
| 3295 // but before attempting to acquire the monitor. This is only a | |
| 3296 // partial solution. It avoids calling HSSEC while holding the | |
| 3297 // monitor (good), but it still increases successor reacquisition latency -- | |
| 3298 // the interval between unparking a successor and the time the successor | |
| 3299 // resumes and retries the lock. See ReenterI(), which defers state transitions. | |
| 3300 // If we use this technique we can also avoid EnterI()-exit() loop | |
| 3301 // in ::enter() where we iteratively drop the lock and then attempt | |
| 3302 // to reacquire it after suspending. | |
| 3303 // | |
| 3304 // B. In the future we might fold all the suspend bits into a | |
| 3305 // composite per-thread suspend flag and then update it with CAS(). | |
| 3306 // Alternately, a Dekker-like mechanism with multiple variables | |
| 3307 // would suffice: | |
| 3308 // ST Self->_suspend_equivalent = false | |
| 3309 // MEMBAR | |
| 3310 // LD Self_>_suspend_flags | |
| 3311 // | |
| 3312 | |
| 3313 | |
| 3314 bool ObjectMonitor::ExitSuspendEquivalent (JavaThread * jSelf) { | |
| 3315 int Mode = Knob_FastHSSEC ; | |
| 3316 if (Mode && !jSelf->is_external_suspend()) { | |
| 3317 assert (jSelf->is_suspend_equivalent(), "invariant") ; | |
| 3318 jSelf->clear_suspend_equivalent() ; | |
| 3319 if (2 == Mode) OrderAccess::storeload() ; | |
| 3320 if (!jSelf->is_external_suspend()) return false ; | |
| 3321 // We raced a suspension -- fall thru into the slow path | |
| 3322 TEVENT (ExitSuspendEquivalent - raced) ; | |
| 3323 jSelf->set_suspend_equivalent() ; | |
| 3324 } | |
| 3325 return jSelf->handle_special_suspend_equivalent_condition() ; | |
| 3326 } | |
| 3327 | |
| 3328 | |
| 3329 // ReenterI() is a specialized inline form of the latter half of the | |
| 3330 // contended slow-path from EnterI(). We use ReenterI() only for | |
| 3331 // monitor reentry in wait(). | |
| 3332 // | |
| 3333 // In the future we should reconcile EnterI() and ReenterI(), adding | |
| 3334 // Knob_Reset and Knob_SpinAfterFutile support and restructuring the | |
| 3335 // loop accordingly. | |
| 3336 | |
| 3337 void ATTR ObjectMonitor::ReenterI (Thread * Self, ObjectWaiter * SelfNode) { | |
| 3338 assert (Self != NULL , "invariant") ; | |
| 3339 assert (SelfNode != NULL , "invariant") ; | |
| 3340 assert (SelfNode->_thread == Self , "invariant") ; | |
| 3341 assert (_waiters > 0 , "invariant") ; | |
| 3342 assert (((oop)(object()))->mark() == markOopDesc::encode(this) , "invariant") ; | |
| 3343 assert (((JavaThread *)Self)->thread_state() != _thread_blocked, "invariant") ; | |
| 3344 JavaThread * jt = (JavaThread *) Self ; | |
| 3345 | |
| 3346 int nWakeups = 0 ; | |
| 3347 for (;;) { | |
| 3348 ObjectWaiter::TStates v = SelfNode->TState ; | |
| 3349 guarantee (v == ObjectWaiter::TS_ENTER || v == ObjectWaiter::TS_CXQ, "invariant") ; | |
| 3350 assert (_owner != Self, "invariant") ; | |
| 3351 | |
| 3352 if (TryLock (Self) > 0) break ; | |
| 3353 if (TrySpin (Self) > 0) break ; | |
| 3354 | |
| 3355 TEVENT (Wait Reentry - parking) ; | |
| 3356 | |
| 3357 // State transition wrappers around park() ... | |
| 3358 // ReenterI() wisely defers state transitions until | |
| 3359 // it's clear we must park the thread. | |
| 3360 { | |
| 3361 OSThreadContendState osts(Self->osthread()); | |
| 3362 ThreadBlockInVM tbivm(jt); | |
| 3363 | |
| 3364 // cleared by handle_special_suspend_equivalent_condition() | |
| 3365 // or java_suspend_self() | |
| 3366 jt->set_suspend_equivalent(); | |
| 3367 if (SyncFlags & 1) { | |
| 3368 Self->_ParkEvent->park ((jlong)1000) ; | |
| 3369 } else { | |
| 3370 Self->_ParkEvent->park () ; | |
| 3371 } | |
| 3372 | |
| 3373 // were we externally suspended while we were waiting? | |
| 3374 for (;;) { | |
| 3375 if (!ExitSuspendEquivalent (jt)) break ; | |
| 3376 if (_succ == Self) { _succ = NULL; OrderAccess::fence(); } | |
| 3377 jt->java_suspend_self(); | |
| 3378 jt->set_suspend_equivalent(); | |
| 3379 } | |
| 3380 } | |
| 3381 | |
| 3382 // Try again, but just so we distinguish between futile wakeups and | |
| 3383 // successful wakeups. The following test isn't algorithmically | |
| 3384 // necessary, but it helps us maintain sensible statistics. | |
| 3385 if (TryLock(Self) > 0) break ; | |
| 3386 | |
| 3387 // The lock is still contested. | |
| 3388 // Keep a tally of the # of futile wakeups. | |
| 3389 // Note that the counter is not protected by a lock or updated by atomics. | |
| 3390 // That is by design - we trade "lossy" counters which are exposed to | |
| 3391 // races during updates for a lower probe effect. | |
| 3392 TEVENT (Wait Reentry - futile wakeup) ; | |
| 3393 ++ nWakeups ; | |
| 3394 | |
| 3395 // Assuming this is not a spurious wakeup we'll normally | |
| 3396 // find that _succ == Self. | |
| 3397 if (_succ == Self) _succ = NULL ; | |
| 3398 | |
| 3399 // Invariant: after clearing _succ a contending thread | |
| 3400 // *must* retry _owner before parking. | |
| 3401 OrderAccess::fence() ; | |
| 3402 | |
| 3403 if (ObjectSynchronizer::_sync_FutileWakeups != NULL) { | |
| 3404 ObjectSynchronizer::_sync_FutileWakeups->inc() ; | |
| 3405 } | |
| 3406 } | |
| 3407 | |
| 3408 // Self has acquired the lock -- Unlink Self from the cxq or EntryList . | |
| 3409 // Normally we'll find Self on the EntryList. | |
| 3410 // Unlinking from the EntryList is constant-time and atomic-free. | |
| 3411 // From the perspective of the lock owner (this thread), the | |
| 3412 // EntryList is stable and cxq is prepend-only. | |
| 3413 // The head of cxq is volatile but the interior is stable. | |
| 3414 // In addition, Self.TState is stable. | |
| 3415 | |
| 3416 assert (_owner == Self, "invariant") ; | |
| 3417 assert (((oop)(object()))->mark() == markOopDesc::encode(this), "invariant") ; | |
| 3418 UnlinkAfterAcquire (Self, SelfNode) ; | |
| 3419 if (_succ == Self) _succ = NULL ; | |
| 3420 assert (_succ != Self, "invariant") ; | |
| 3421 SelfNode->TState = ObjectWaiter::TS_RUN ; | |
| 3422 OrderAccess::fence() ; // see comments at the end of EnterI() | |
| 3423 } | |
| 3424 | |
| 3425 bool ObjectMonitor::try_enter(Thread* THREAD) { | |
| 3426 if (THREAD != _owner) { | |
| 3427 if (THREAD->is_lock_owned ((address)_owner)) { | |
| 3428 assert(_recursions == 0, "internal state error"); | |
| 3429 _owner = THREAD ; | |
| 3430 _recursions = 1 ; | |
| 3431 OwnerIsThread = 1 ; | |
| 3432 return true; | |
| 3433 } | |
| 3434 if (Atomic::cmpxchg_ptr (THREAD, &_owner, NULL) != NULL) { | |
| 3435 return false; | |
| 3436 } | |
| 3437 return true; | |
| 3438 } else { | |
| 3439 _recursions++; | |
| 3440 return true; | |
| 3441 } | |
| 3442 } | |
| 3443 | |
| 3444 void ATTR ObjectMonitor::enter(TRAPS) { | |
| 3445 // The following code is ordered to check the most common cases first | |
| 3446 // and to reduce RTS->RTO cache line upgrades on SPARC and IA32 processors. | |
| 3447 Thread * const Self = THREAD ; | |
| 3448 void * cur ; | |
| 3449 | |
| 3450 cur = Atomic::cmpxchg_ptr (Self, &_owner, NULL) ; | |
| 3451 if (cur == NULL) { | |
| 3452 // Either ASSERT _recursions == 0 or explicitly set _recursions = 0. | |
| 3453 assert (_recursions == 0 , "invariant") ; | |
| 3454 assert (_owner == Self, "invariant") ; | |
| 3455 // CONSIDER: set or assert OwnerIsThread == 1 | |
| 3456 return ; | |
| 3457 } | |
| 3458 | |
| 3459 if (cur == Self) { | |
| 3460 // TODO-FIXME: check for integer overflow! BUGID 6557169. | |
| 3461 _recursions ++ ; | |
| 3462 return ; | |
| 3463 } | |
| 3464 | |
| 3465 if (Self->is_lock_owned ((address)cur)) { | |
| 3466 assert (_recursions == 0, "internal state error"); | |
| 3467 _recursions = 1 ; | |
| 3468 // Commute owner from a thread-specific on-stack BasicLockObject address to | |
| 3469 // a full-fledged "Thread *". | |
| 3470 _owner = Self ; | |
| 3471 OwnerIsThread = 1 ; | |
| 3472 return ; | |
| 3473 } | |
| 3474 | |
| 3475 // We've encountered genuine contention. | |
| 3476 assert (Self->_Stalled == 0, "invariant") ; | |
| 3477 Self->_Stalled = intptr_t(this) ; | |
| 3478 | |
| 3479 // Try one round of spinning *before* enqueueing Self | |
| 3480 // and before going through the awkward and expensive state | |
| 3481 // transitions. The following spin is strictly optional ... | |
| 3482 // Note that if we acquire the monitor from an initial spin | |
| 3483 // we forgo posting JVMTI events and firing DTRACE probes. | |
| 3484 if (Knob_SpinEarly && TrySpin (Self) > 0) { | |
| 3485 assert (_owner == Self , "invariant") ; | |
| 3486 assert (_recursions == 0 , "invariant") ; | |
| 3487 assert (((oop)(object()))->mark() == markOopDesc::encode(this), "invariant") ; | |
| 3488 Self->_Stalled = 0 ; | |
| 3489 return ; | |
| 3490 } | |
| 3491 | |
| 3492 assert (_owner != Self , "invariant") ; | |
| 3493 assert (_succ != Self , "invariant") ; | |
| 3494 assert (Self->is_Java_thread() , "invariant") ; | |
| 3495 JavaThread * jt = (JavaThread *) Self ; | |
| 3496 assert (!SafepointSynchronize::is_at_safepoint(), "invariant") ; | |
| 3497 assert (jt->thread_state() != _thread_blocked , "invariant") ; | |
| 3498 assert (this->object() != NULL , "invariant") ; | |
| 3499 assert (_count >= 0, "invariant") ; | |
| 3500 | |
| 3501 // Prevent deflation at STW-time. See deflate_idle_monitors() and is_busy(). | |
| 3502 // Ensure the object-monitor relationship remains stable while there's contention. | |
| 3503 Atomic::inc_ptr(&_count); | |
| 3504 | |
| 3505 { // Change java thread status to indicate blocked on monitor enter. | |
| 3506 JavaThreadBlockedOnMonitorEnterState jtbmes(jt, this); | |
| 3507 | |
| 3508 DTRACE_MONITOR_PROBE(contended__enter, this, object(), jt); | |
| 3509 if (JvmtiExport::should_post_monitor_contended_enter()) { | |
| 3510 JvmtiExport::post_monitor_contended_enter(jt, this); | |
| 3511 } | |
| 3512 | |
| 3513 OSThreadContendState osts(Self->osthread()); | |
| 3514 ThreadBlockInVM tbivm(jt); | |
| 3515 | |
| 3516 Self->set_current_pending_monitor(this); | |
| 3517 | |
| 3518 // TODO-FIXME: change the following for(;;) loop to straight-line code. | |
| 3519 for (;;) { | |
| 3520 jt->set_suspend_equivalent(); | |
| 3521 // cleared by handle_special_suspend_equivalent_condition() | |
| 3522 // or java_suspend_self() | |
| 3523 | |
| 3524 EnterI (THREAD) ; | |
| 3525 | |
| 3526 if (!ExitSuspendEquivalent(jt)) break ; | |
| 3527 | |
| 3528 // | |
| 3529 // We have acquired the contended monitor, but while we were | |
| 3530 // waiting another thread suspended us. We don't want to enter | |
| 3531 // the monitor while suspended because that would surprise the | |
| 3532 // thread that suspended us. | |
| 3533 // | |
| 3534 _recursions = 0 ; | |
| 3535 _succ = NULL ; | |
| 3536 exit (Self) ; | |
| 3537 | |
| 3538 jt->java_suspend_self(); | |
| 3539 } | |
| 3540 Self->set_current_pending_monitor(NULL); | |
| 3541 } | |
| 3542 | |
| 3543 Atomic::dec_ptr(&_count); | |
| 3544 assert (_count >= 0, "invariant") ; | |
| 3545 Self->_Stalled = 0 ; | |
| 3546 | |
| 3547 // Must either set _recursions = 0 or ASSERT _recursions == 0. | |
| 3548 assert (_recursions == 0 , "invariant") ; | |
| 3549 assert (_owner == Self , "invariant") ; | |
| 3550 assert (_succ != Self , "invariant") ; | |
| 3551 assert (((oop)(object()))->mark() == markOopDesc::encode(this), "invariant") ; | |
| 3552 | |
| 3553 // The thread -- now the owner -- is back in vm mode. | |
| 3554 // Report the glorious news via TI,DTrace and jvmstat. | |
| 3555 // The probe effect is non-trivial. All the reportage occurs | |
| 3556 // while we hold the monitor, increasing the length of the critical | |
| 3557 // section. Amdahl's parallel speedup law comes vividly into play. | |
| 3558 // | |
| 3559 // Another option might be to aggregate the events (thread local or | |
| 3560 // per-monitor aggregation) and defer reporting until a more opportune | |
| 3561 // time -- such as next time some thread encounters contention but has | |
| 3562 // yet to acquire the lock. While spinning that thread could | |
| 3563 // spinning we could increment JVMStat counters, etc. | |
| 3564 | |
| 3565 DTRACE_MONITOR_PROBE(contended__entered, this, object(), jt); | |
| 3566 if (JvmtiExport::should_post_monitor_contended_entered()) { | |
| 3567 JvmtiExport::post_monitor_contended_entered(jt, this); | |
| 3568 } | |
| 3569 if (ObjectSynchronizer::_sync_ContendedLockAttempts != NULL) { | |
| 3570 ObjectSynchronizer::_sync_ContendedLockAttempts->inc() ; | |
| 3571 } | |
| 3572 } | |
| 3573 | |
| 3574 void ObjectMonitor::ExitEpilog (Thread * Self, ObjectWaiter * Wakee) { | |
| 3575 assert (_owner == Self, "invariant") ; | |
| 3576 | |
| 3577 // Exit protocol: | |
| 3578 // 1. ST _succ = wakee | |
| 3579 // 2. membar #loadstore|#storestore; | |
| 3580 // 2. ST _owner = NULL | |
| 3581 // 3. unpark(wakee) | |
| 3582 | |
| 3583 _succ = Knob_SuccEnabled ? Wakee->_thread : NULL ; | |
| 3584 ParkEvent * Trigger = Wakee->_event ; | |
| 3585 | |
| 3586 // Hygiene -- once we've set _owner = NULL we can't safely dereference Wakee again. | |
| 3587 // The thread associated with Wakee may have grabbed the lock and "Wakee" may be | |
| 3588 // out-of-scope (non-extant). | |
| 3589 Wakee = NULL ; | |
| 3590 | |
| 3591 // Drop the lock | |
| 3592 OrderAccess::release_store_ptr (&_owner, NULL) ; | |
| 3593 OrderAccess::fence() ; // ST _owner vs LD in unpark() | |
| 3594 | |
| 3595 // TODO-FIXME: | |
| 3596 // If there's a safepoint pending the best policy would be to | |
| 3597 // get _this thread to a safepoint and only wake the successor | |
| 3598 // after the safepoint completed. monitorexit uses a "leaf" | |
| 3599 // state transition, however, so this thread can't become | |
| 3600 // safe at this point in time. (Its stack isn't walkable). | |
| 3601 // The next best thing is to defer waking the successor by | |
| 3602 // adding to a list of thread to be unparked after at the | |
| 3603 // end of the forthcoming STW). | |
| 3604 if (SafepointSynchronize::do_call_back()) { | |
| 3605 TEVENT (unpark before SAFEPOINT) ; | |
| 3606 } | |
| 3607 | |
| 3608 // Possible optimizations ... | |
| 3609 // | |
| 3610 // * Consider: set Wakee->UnparkTime = timeNow() | |
| 3611 // When the thread wakes up it'll compute (timeNow() - Self->UnparkTime()). | |
| 3612 // By measuring recent ONPROC latency we can approximate the | |
| 3613 // system load. In turn, we can feed that information back | |
| 3614 // into the spinning & succession policies. | |
| 3615 // (ONPROC latency correlates strongly with load). | |
| 3616 // | |
| 3617 // * Pull affinity: | |
| 3618 // If the wakee is cold then transiently setting it's affinity | |
| 3619 // to the current CPU is a good idea. | |
| 3620 // See http://j2se.east/~dice/PERSIST/050624-PullAffinity.txt | |
|
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diff
changeset
|
3621 DTRACE_MONITOR_PROBE(contended__exit, this, object(), Self); |
| 0 | 3622 Trigger->unpark() ; |
| 3623 | |
| 3624 // Maintain stats and report events to JVMTI | |
| 3625 if (ObjectSynchronizer::_sync_Parks != NULL) { | |
| 3626 ObjectSynchronizer::_sync_Parks->inc() ; | |
| 3627 } | |
| 3628 } | |
| 3629 | |
| 3630 | |
| 3631 // exit() | |
| 3632 // ~~~~~~ | |
| 3633 // Note that the collector can't reclaim the objectMonitor or deflate | |
| 3634 // the object out from underneath the thread calling ::exit() as the | |
| 3635 // thread calling ::exit() never transitions to a stable state. | |
| 3636 // This inhibits GC, which in turn inhibits asynchronous (and | |
| 3637 // inopportune) reclamation of "this". | |
| 3638 // | |
| 3639 // We'd like to assert that: (THREAD->thread_state() != _thread_blocked) ; | |
| 3640 // There's one exception to the claim above, however. EnterI() can call | |
| 3641 // exit() to drop a lock if the acquirer has been externally suspended. | |
| 3642 // In that case exit() is called with _thread_state as _thread_blocked, | |
| 3643 // but the monitor's _count field is > 0, which inhibits reclamation. | |
| 3644 // | |
| 3645 // 1-0 exit | |
| 3646 // ~~~~~~~~ | |
| 3647 // ::exit() uses a canonical 1-1 idiom with a MEMBAR although some of | |
| 3648 // the fast-path operators have been optimized so the common ::exit() | |
| 3649 // operation is 1-0. See i486.ad fast_unlock(), for instance. | |
| 3650 // The code emitted by fast_unlock() elides the usual MEMBAR. This | |
| 3651 // greatly improves latency -- MEMBAR and CAS having considerable local | |
| 3652 // latency on modern processors -- but at the cost of "stranding". Absent the | |
| 3653 // MEMBAR, a thread in fast_unlock() can race a thread in the slow | |
| 3654 // ::enter() path, resulting in the entering thread being stranding | |
| 3655 // and a progress-liveness failure. Stranding is extremely rare. | |
| 3656 // We use timers (timed park operations) & periodic polling to detect | |
| 3657 // and recover from stranding. Potentially stranded threads periodically | |
| 3658 // wake up and poll the lock. See the usage of the _Responsible variable. | |
| 3659 // | |
| 3660 // The CAS() in enter provides for safety and exclusion, while the CAS or | |
| 3661 // MEMBAR in exit provides for progress and avoids stranding. 1-0 locking | |
| 3662 // eliminates the CAS/MEMBAR from the exist path, but it admits stranding. | |
| 3663 // We detect and recover from stranding with timers. | |
| 3664 // | |
| 3665 // If a thread transiently strands it'll park until (a) another | |
| 3666 // thread acquires the lock and then drops the lock, at which time the | |
| 3667 // exiting thread will notice and unpark the stranded thread, or, (b) | |
| 3668 // the timer expires. If the lock is high traffic then the stranding latency | |
| 3669 // will be low due to (a). If the lock is low traffic then the odds of | |
| 3670 // stranding are lower, although the worst-case stranding latency | |
| 3671 // is longer. Critically, we don't want to put excessive load in the | |
| 3672 // platform's timer subsystem. We want to minimize both the timer injection | |
| 3673 // rate (timers created/sec) as well as the number of timers active at | |
| 3674 // any one time. (more precisely, we want to minimize timer-seconds, which is | |
| 3675 // the integral of the # of active timers at any instant over time). | |
| 3676 // Both impinge on OS scalability. Given that, at most one thread parked on | |
| 3677 // a monitor will use a timer. | |
| 3678 | |
| 3679 void ATTR ObjectMonitor::exit(TRAPS) { | |
| 3680 Thread * Self = THREAD ; | |
| 3681 if (THREAD != _owner) { | |
| 3682 if (THREAD->is_lock_owned((address) _owner)) { | |
| 3683 // Transmute _owner from a BasicLock pointer to a Thread address. | |
| 3684 // We don't need to hold _mutex for this transition. | |
| 3685 // Non-null to Non-null is safe as long as all readers can | |
| 3686 // tolerate either flavor. | |
| 3687 assert (_recursions == 0, "invariant") ; | |
| 3688 _owner = THREAD ; | |
| 3689 _recursions = 0 ; | |
| 3690 OwnerIsThread = 1 ; | |
| 3691 } else { | |
| 3692 // NOTE: we need to handle unbalanced monitor enter/exit | |
| 3693 // in native code by throwing an exception. | |
| 3694 // TODO: Throw an IllegalMonitorStateException ? | |
| 3695 TEVENT (Exit - Throw IMSX) ; | |
| 3696 assert(false, "Non-balanced monitor enter/exit!"); | |
| 3697 if (false) { | |
| 3698 THROW(vmSymbols::java_lang_IllegalMonitorStateException()); | |
| 3699 } | |
| 3700 return; | |
| 3701 } | |
| 3702 } | |
| 3703 | |
| 3704 if (_recursions != 0) { | |
| 3705 _recursions--; // this is simple recursive enter | |
| 3706 TEVENT (Inflated exit - recursive) ; | |
| 3707 return ; | |
| 3708 } | |
| 3709 | |
| 3710 // Invariant: after setting Responsible=null an thread must execute | |
| 3711 // a MEMBAR or other serializing instruction before fetching EntryList|cxq. | |
| 3712 if ((SyncFlags & 4) == 0) { | |
| 3713 _Responsible = NULL ; | |
| 3714 } | |
| 3715 | |
| 3716 for (;;) { | |
| 3717 assert (THREAD == _owner, "invariant") ; | |
| 3718 | |
| 3719 // Fast-path monitor exit: | |
| 3720 // | |
| 3721 // Observe the Dekker/Lamport duality: | |
| 3722 // A thread in ::exit() executes: | |
| 3723 // ST Owner=null; MEMBAR; LD EntryList|cxq. | |
| 3724 // A thread in the contended ::enter() path executes the complementary: | |
| 3725 // ST EntryList|cxq = nonnull; MEMBAR; LD Owner. | |
| 3726 // | |
| 3727 // Note that there's a benign race in the exit path. We can drop the | |
| 3728 // lock, another thread can reacquire the lock immediately, and we can | |
| 3729 // then wake a thread unnecessarily (yet another flavor of futile wakeup). | |
| 3730 // This is benign, and we've structured the code so the windows are short | |
| 3731 // and the frequency of such futile wakeups is low. | |
| 3732 // | |
| 3733 // We could eliminate the race by encoding both the "LOCKED" state and | |
| 3734 // the queue head in a single word. Exit would then use either CAS to | |
| 3735 // clear the LOCKED bit/byte. This precludes the desirable 1-0 optimization, | |
| 3736 // however. | |
| 3737 // | |
| 3738 // Possible fast-path ::exit() optimization: | |
| 3739 // The current fast-path exit implementation fetches both cxq and EntryList. | |
| 3740 // See also i486.ad fast_unlock(). Testing has shown that two LDs | |
| 3741 // isn't measurably slower than a single LD on any platforms. | |
| 3742 // Still, we could reduce the 2 LDs to one or zero by one of the following: | |
| 3743 // | |
| 3744 // - Use _count instead of cxq|EntryList | |
| 3745 // We intend to eliminate _count, however, when we switch | |
| 3746 // to on-the-fly deflation in ::exit() as is used in | |
| 3747 // Metalocks and RelaxedLocks. | |
| 3748 // | |
| 3749 // - Establish the invariant that cxq == null implies EntryList == null. | |
| 3750 // set cxq == EMPTY (1) to encode the state where cxq is empty | |
| 3751 // by EntryList != null. EMPTY is a distinguished value. | |
| 3752 // The fast-path exit() would fetch cxq but not EntryList. | |
| 3753 // | |
| 3754 // - Encode succ as follows: | |
| 3755 // succ = t : Thread t is the successor -- t is ready or is spinning. | |
| 3756 // Exiting thread does not need to wake a successor. | |
| 3757 // succ = 0 : No successor required -> (EntryList|cxq) == null | |
| 3758 // Exiting thread does not need to wake a successor | |
| 3759 // succ = 1 : Successor required -> (EntryList|cxq) != null and | |
| 3760 // logically succ == null. | |
| 3761 // Exiting thread must wake a successor. | |
| 3762 // | |
| 3763 // The 1-1 fast-exit path would appear as : | |
| 3764 // _owner = null ; membar ; | |
| 3765 // if (_succ == 1 && CAS (&_owner, null, Self) == null) goto SlowPath | |
| 3766 // goto FastPathDone ; | |
| 3767 // | |
| 3768 // and the 1-0 fast-exit path would appear as: | |
| 3769 // if (_succ == 1) goto SlowPath | |
| 3770 // Owner = null ; | |
| 3771 // goto FastPathDone | |
| 3772 // | |
| 3773 // - Encode the LSB of _owner as 1 to indicate that exit() | |
| 3774 // must use the slow-path and make a successor ready. | |
| 3775 // (_owner & 1) == 0 IFF succ != null || (EntryList|cxq) == null | |
| 3776 // (_owner & 1) == 0 IFF succ == null && (EntryList|cxq) != null (obviously) | |
| 3777 // The 1-0 fast exit path would read: | |
| 3778 // if (_owner != Self) goto SlowPath | |
| 3779 // _owner = null | |
| 3780 // goto FastPathDone | |
| 3781 | |
| 3782 if (Knob_ExitPolicy == 0) { | |
| 3783 // release semantics: prior loads and stores from within the critical section | |
| 3784 // must not float (reorder) past the following store that drops the lock. | |
| 3785 // On SPARC that requires MEMBAR #loadstore|#storestore. | |
| 3786 // But of course in TSO #loadstore|#storestore is not required. | |
| 3787 // I'd like to write one of the following: | |
| 3788 // A. OrderAccess::release() ; _owner = NULL | |
| 3789 // B. OrderAccess::loadstore(); OrderAccess::storestore(); _owner = NULL; | |
| 3790 // Unfortunately OrderAccess::release() and OrderAccess::loadstore() both | |
| 3791 // store into a _dummy variable. That store is not needed, but can result | |
| 3792 // in massive wasteful coherency traffic on classic SMP systems. | |
| 3793 // Instead, I use release_store(), which is implemented as just a simple | |
| 3794 // ST on x64, x86 and SPARC. | |
| 3795 OrderAccess::release_store_ptr (&_owner, NULL) ; // drop the lock | |
| 3796 OrderAccess::storeload() ; // See if we need to wake a successor | |
| 3797 if ((intptr_t(_EntryList)|intptr_t(_cxq)) == 0 || _succ != NULL) { | |
| 3798 TEVENT (Inflated exit - simple egress) ; | |
| 3799 return ; | |
| 3800 } | |
| 3801 TEVENT (Inflated exit - complex egress) ; | |
| 3802 | |
| 3803 // Normally the exiting thread is responsible for ensuring succession, | |
| 3804 // but if other successors are ready or other entering threads are spinning | |
| 3805 // then this thread can simply store NULL into _owner and exit without | |
| 3806 // waking a successor. The existence of spinners or ready successors | |
| 3807 // guarantees proper succession (liveness). Responsibility passes to the | |
| 3808 // ready or running successors. The exiting thread delegates the duty. | |
| 3809 // More precisely, if a successor already exists this thread is absolved | |
| 3810 // of the responsibility of waking (unparking) one. | |
| 3811 // | |
| 3812 // The _succ variable is critical to reducing futile wakeup frequency. | |
| 3813 // _succ identifies the "heir presumptive" thread that has been made | |
| 3814 // ready (unparked) but that has not yet run. We need only one such | |
| 3815 // successor thread to guarantee progress. | |
| 3816 // See http://www.usenix.org/events/jvm01/full_papers/dice/dice.pdf | |
| 3817 // section 3.3 "Futile Wakeup Throttling" for details. | |
| 3818 // | |
| 3819 // Note that spinners in Enter() also set _succ non-null. | |
| 3820 // In the current implementation spinners opportunistically set | |
| 3821 // _succ so that exiting threads might avoid waking a successor. | |
| 3822 // Another less appealing alternative would be for the exiting thread | |
| 3823 // to drop the lock and then spin briefly to see if a spinner managed | |
| 3824 // to acquire the lock. If so, the exiting thread could exit | |
| 3825 // immediately without waking a successor, otherwise the exiting | |
| 3826 // thread would need to dequeue and wake a successor. | |
| 3827 // (Note that we'd need to make the post-drop spin short, but no | |
| 3828 // shorter than the worst-case round-trip cache-line migration time. | |
| 3829 // The dropped lock needs to become visible to the spinner, and then | |
| 3830 // the acquisition of the lock by the spinner must become visible to | |
| 3831 // the exiting thread). | |
| 3832 // | |
| 3833 | |
| 3834 // It appears that an heir-presumptive (successor) must be made ready. | |
| 3835 // Only the current lock owner can manipulate the EntryList or | |
| 3836 // drain _cxq, so we need to reacquire the lock. If we fail | |
| 3837 // to reacquire the lock the responsibility for ensuring succession | |
| 3838 // falls to the new owner. | |
| 3839 // | |
| 3840 if (Atomic::cmpxchg_ptr (THREAD, &_owner, NULL) != NULL) { | |
| 3841 return ; | |
| 3842 } | |
| 3843 TEVENT (Exit - Reacquired) ; | |
| 3844 } else { | |
| 3845 if ((intptr_t(_EntryList)|intptr_t(_cxq)) == 0 || _succ != NULL) { | |
| 3846 OrderAccess::release_store_ptr (&_owner, NULL) ; // drop the lock | |
| 3847 OrderAccess::storeload() ; | |
| 3848 // Ratify the previously observed values. | |
| 3849 if (_cxq == NULL || _succ != NULL) { | |
| 3850 TEVENT (Inflated exit - simple egress) ; | |
| 3851 return ; | |
| 3852 } | |
| 3853 | |
| 3854 // inopportune interleaving -- the exiting thread (this thread) | |
| 3855 // in the fast-exit path raced an entering thread in the slow-enter | |
| 3856 // path. | |
| 3857 // We have two choices: | |
| 3858 // A. Try to reacquire the lock. | |
| 3859 // If the CAS() fails return immediately, otherwise | |
| 3860 // we either restart/rerun the exit operation, or simply | |
| 3861 // fall-through into the code below which wakes a successor. | |
| 3862 // B. If the elements forming the EntryList|cxq are TSM | |
| 3863 // we could simply unpark() the lead thread and return | |
| 3864 // without having set _succ. | |
| 3865 if (Atomic::cmpxchg_ptr (THREAD, &_owner, NULL) != NULL) { | |
| 3866 TEVENT (Inflated exit - reacquired succeeded) ; | |
| 3867 return ; | |
| 3868 } | |
| 3869 TEVENT (Inflated exit - reacquired failed) ; | |
| 3870 } else { | |
| 3871 TEVENT (Inflated exit - complex egress) ; | |
| 3872 } | |
| 3873 } | |
| 3874 | |
| 3875 guarantee (_owner == THREAD, "invariant") ; | |
| 3876 | |
| 3877 // Select an appropriate successor ("heir presumptive") from the EntryList | |
| 3878 // and make it ready. Generally we just wake the head of EntryList . | |
| 3879 // There's no algorithmic constraint that we use the head - it's just | |
| 3880 // a policy decision. Note that the thread at head of the EntryList | |
| 3881 // remains at the head until it acquires the lock. This means we'll | |
| 3882 // repeatedly wake the same thread until it manages to grab the lock. | |
| 3883 // This is generally a good policy - if we're seeing lots of futile wakeups | |
| 3884 // at least we're waking/rewaking a thread that's like to be hot or warm | |
| 3885 // (have residual D$ and TLB affinity). | |
| 3886 // | |
| 3887 // "Wakeup locality" optimization: | |
| 3888 // http://j2se.east/~dice/PERSIST/040825-WakeLocality.txt | |
| 3889 // In the future we'll try to bias the selection mechanism | |
| 3890 // to preferentially pick a thread that recently ran on | |
| 3891 // a processor element that shares cache with the CPU on which | |
| 3892 // the exiting thread is running. We need access to Solaris' | |
| 3893 // schedctl.sc_cpu to make that work. | |
| 3894 // | |
| 3895 ObjectWaiter * w = NULL ; | |
| 3896 int QMode = Knob_QMode ; | |
| 3897 | |
| 3898 if (QMode == 2 && _cxq != NULL) { | |
| 3899 // QMode == 2 : cxq has precedence over EntryList. | |
| 3900 // Try to directly wake a successor from the cxq. | |
| 3901 // If successful, the successor will need to unlink itself from cxq. | |
| 3902 w = _cxq ; | |
| 3903 assert (w != NULL, "invariant") ; | |
| 3904 assert (w->TState == ObjectWaiter::TS_CXQ, "Invariant") ; | |
| 3905 ExitEpilog (Self, w) ; | |
| 3906 return ; | |
| 3907 } | |
| 3908 | |
| 3909 if (QMode == 3 && _cxq != NULL) { | |
| 3910 // Aggressively drain cxq into EntryList at the first opportunity. | |
| 3911 // This policy ensure that recently-run threads live at the head of EntryList. | |
| 3912 // Drain _cxq into EntryList - bulk transfer. | |
| 3913 // First, detach _cxq. | |
| 3914 // The following loop is tantamount to: w = swap (&cxq, NULL) | |
| 3915 w = _cxq ; | |
| 3916 for (;;) { | |
| 3917 assert (w != NULL, "Invariant") ; | |
| 3918 ObjectWaiter * u = (ObjectWaiter *) Atomic::cmpxchg_ptr (NULL, &_cxq, w) ; | |
| 3919 if (u == w) break ; | |
| 3920 w = u ; | |
| 3921 } | |
| 3922 assert (w != NULL , "invariant") ; | |
| 3923 | |
| 3924 ObjectWaiter * q = NULL ; | |
| 3925 ObjectWaiter * p ; | |
| 3926 for (p = w ; p != NULL ; p = p->_next) { | |
| 3927 guarantee (p->TState == ObjectWaiter::TS_CXQ, "Invariant") ; | |
| 3928 p->TState = ObjectWaiter::TS_ENTER ; | |
| 3929 p->_prev = q ; | |
| 3930 q = p ; | |
| 3931 } | |
| 3932 | |
| 3933 // Append the RATs to the EntryList | |
| 3934 // TODO: organize EntryList as a CDLL so we can locate the tail in constant-time. | |
| 3935 ObjectWaiter * Tail ; | |
| 3936 for (Tail = _EntryList ; Tail != NULL && Tail->_next != NULL ; Tail = Tail->_next) ; | |
| 3937 if (Tail == NULL) { | |
| 3938 _EntryList = w ; | |
| 3939 } else { | |
| 3940 Tail->_next = w ; | |
| 3941 w->_prev = Tail ; | |
| 3942 } | |
| 3943 | |
| 3944 // Fall thru into code that tries to wake a successor from EntryList | |
| 3945 } | |
| 3946 | |
| 3947 if (QMode == 4 && _cxq != NULL) { | |
| 3948 // Aggressively drain cxq into EntryList at the first opportunity. | |
| 3949 // This policy ensure that recently-run threads live at the head of EntryList. | |
| 3950 | |
| 3951 // Drain _cxq into EntryList - bulk transfer. | |
| 3952 // First, detach _cxq. | |
| 3953 // The following loop is tantamount to: w = swap (&cxq, NULL) | |
| 3954 w = _cxq ; | |
| 3955 for (;;) { | |
| 3956 assert (w != NULL, "Invariant") ; | |
| 3957 ObjectWaiter * u = (ObjectWaiter *) Atomic::cmpxchg_ptr (NULL, &_cxq, w) ; | |
| 3958 if (u == w) break ; | |
| 3959 w = u ; | |
| 3960 } | |
| 3961 assert (w != NULL , "invariant") ; | |
| 3962 | |
| 3963 ObjectWaiter * q = NULL ; | |
| 3964 ObjectWaiter * p ; | |
| 3965 for (p = w ; p != NULL ; p = p->_next) { | |
| 3966 guarantee (p->TState == ObjectWaiter::TS_CXQ, "Invariant") ; | |
| 3967 p->TState = ObjectWaiter::TS_ENTER ; | |
| 3968 p->_prev = q ; | |
| 3969 q = p ; | |
| 3970 } | |
| 3971 | |
| 3972 // Prepend the RATs to the EntryList | |
| 3973 if (_EntryList != NULL) { | |
| 3974 q->_next = _EntryList ; | |
| 3975 _EntryList->_prev = q ; | |
| 3976 } | |
| 3977 _EntryList = w ; | |
| 3978 | |
| 3979 // Fall thru into code that tries to wake a successor from EntryList | |
| 3980 } | |
| 3981 | |
| 3982 w = _EntryList ; | |
| 3983 if (w != NULL) { | |
| 3984 // I'd like to write: guarantee (w->_thread != Self). | |
| 3985 // But in practice an exiting thread may find itself on the EntryList. | |
| 3986 // Lets say thread T1 calls O.wait(). Wait() enqueues T1 on O's waitset and | |
| 3987 // then calls exit(). Exit release the lock by setting O._owner to NULL. | |
| 3988 // Lets say T1 then stalls. T2 acquires O and calls O.notify(). The | |
| 3989 // notify() operation moves T1 from O's waitset to O's EntryList. T2 then | |
| 3990 // release the lock "O". T2 resumes immediately after the ST of null into | |
| 3991 // _owner, above. T2 notices that the EntryList is populated, so it | |
| 3992 // reacquires the lock and then finds itself on the EntryList. | |
| 3993 // Given all that, we have to tolerate the circumstance where "w" is | |
| 3994 // associated with Self. | |
| 3995 assert (w->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 3996 ExitEpilog (Self, w) ; | |
| 3997 return ; | |
| 3998 } | |
| 3999 | |
| 4000 // If we find that both _cxq and EntryList are null then just | |
| 4001 // re-run the exit protocol from the top. | |
| 4002 w = _cxq ; | |
| 4003 if (w == NULL) continue ; | |
| 4004 | |
| 4005 // Drain _cxq into EntryList - bulk transfer. | |
| 4006 // First, detach _cxq. | |
| 4007 // The following loop is tantamount to: w = swap (&cxq, NULL) | |
| 4008 for (;;) { | |
| 4009 assert (w != NULL, "Invariant") ; | |
| 4010 ObjectWaiter * u = (ObjectWaiter *) Atomic::cmpxchg_ptr (NULL, &_cxq, w) ; | |
| 4011 if (u == w) break ; | |
| 4012 w = u ; | |
| 4013 } | |
| 4014 TEVENT (Inflated exit - drain cxq into EntryList) ; | |
| 4015 | |
| 4016 assert (w != NULL , "invariant") ; | |
| 4017 assert (_EntryList == NULL , "invariant") ; | |
| 4018 | |
| 4019 // Convert the LIFO SLL anchored by _cxq into a DLL. | |
| 4020 // The list reorganization step operates in O(LENGTH(w)) time. | |
| 4021 // It's critical that this step operate quickly as | |
| 4022 // "Self" still holds the outer-lock, restricting parallelism | |
| 4023 // and effectively lengthening the critical section. | |
| 4024 // Invariant: s chases t chases u. | |
| 4025 // TODO-FIXME: consider changing EntryList from a DLL to a CDLL so | |
| 4026 // we have faster access to the tail. | |
| 4027 | |
| 4028 if (QMode == 1) { | |
| 4029 // QMode == 1 : drain cxq to EntryList, reversing order | |
| 4030 // We also reverse the order of the list. | |
| 4031 ObjectWaiter * s = NULL ; | |
| 4032 ObjectWaiter * t = w ; | |
| 4033 ObjectWaiter * u = NULL ; | |
| 4034 while (t != NULL) { | |
| 4035 guarantee (t->TState == ObjectWaiter::TS_CXQ, "invariant") ; | |
| 4036 t->TState = ObjectWaiter::TS_ENTER ; | |
| 4037 u = t->_next ; | |
| 4038 t->_prev = u ; | |
| 4039 t->_next = s ; | |
| 4040 s = t; | |
| 4041 t = u ; | |
| 4042 } | |
| 4043 _EntryList = s ; | |
| 4044 assert (s != NULL, "invariant") ; | |
| 4045 } else { | |
| 4046 // QMode == 0 or QMode == 2 | |
| 4047 _EntryList = w ; | |
| 4048 ObjectWaiter * q = NULL ; | |
| 4049 ObjectWaiter * p ; | |
| 4050 for (p = w ; p != NULL ; p = p->_next) { | |
| 4051 guarantee (p->TState == ObjectWaiter::TS_CXQ, "Invariant") ; | |
| 4052 p->TState = ObjectWaiter::TS_ENTER ; | |
| 4053 p->_prev = q ; | |
| 4054 q = p ; | |
| 4055 } | |
| 4056 } | |
| 4057 | |
| 4058 // In 1-0 mode we need: ST EntryList; MEMBAR #storestore; ST _owner = NULL | |
| 4059 // The MEMBAR is satisfied by the release_store() operation in ExitEpilog(). | |
| 4060 | |
| 4061 // See if we can abdicate to a spinner instead of waking a thread. | |
| 4062 // A primary goal of the implementation is to reduce the | |
| 4063 // context-switch rate. | |
| 4064 if (_succ != NULL) continue; | |
| 4065 | |
| 4066 w = _EntryList ; | |
| 4067 if (w != NULL) { | |
| 4068 guarantee (w->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 4069 ExitEpilog (Self, w) ; | |
| 4070 return ; | |
| 4071 } | |
| 4072 } | |
| 4073 } | |
| 4074 // complete_exit exits a lock returning recursion count | |
| 4075 // complete_exit/reenter operate as a wait without waiting | |
| 4076 // complete_exit requires an inflated monitor | |
| 4077 // The _owner field is not always the Thread addr even with an | |
| 4078 // inflated monitor, e.g. the monitor can be inflated by a non-owning | |
| 4079 // thread due to contention. | |
| 4080 intptr_t ObjectMonitor::complete_exit(TRAPS) { | |
| 4081 Thread * const Self = THREAD; | |
| 4082 assert(Self->is_Java_thread(), "Must be Java thread!"); | |
| 4083 JavaThread *jt = (JavaThread *)THREAD; | |
| 4084 | |
| 4085 DeferredInitialize(); | |
| 4086 | |
| 4087 if (THREAD != _owner) { | |
| 4088 if (THREAD->is_lock_owned ((address)_owner)) { | |
| 4089 assert(_recursions == 0, "internal state error"); | |
| 4090 _owner = THREAD ; /* Convert from basiclock addr to Thread addr */ | |
| 4091 _recursions = 0 ; | |
| 4092 OwnerIsThread = 1 ; | |
| 4093 } | |
| 4094 } | |
| 4095 | |
| 4096 guarantee(Self == _owner, "complete_exit not owner"); | |
| 4097 intptr_t save = _recursions; // record the old recursion count | |
| 4098 _recursions = 0; // set the recursion level to be 0 | |
| 4099 exit (Self) ; // exit the monitor | |
| 4100 guarantee (_owner != Self, "invariant"); | |
| 4101 return save; | |
| 4102 } | |
| 4103 | |
| 4104 // reenter() enters a lock and sets recursion count | |
| 4105 // complete_exit/reenter operate as a wait without waiting | |
| 4106 void ObjectMonitor::reenter(intptr_t recursions, TRAPS) { | |
| 4107 Thread * const Self = THREAD; | |
| 4108 assert(Self->is_Java_thread(), "Must be Java thread!"); | |
| 4109 JavaThread *jt = (JavaThread *)THREAD; | |
| 4110 | |
| 4111 guarantee(_owner != Self, "reenter already owner"); | |
| 4112 enter (THREAD); // enter the monitor | |
| 4113 guarantee (_recursions == 0, "reenter recursion"); | |
| 4114 _recursions = recursions; | |
| 4115 return; | |
| 4116 } | |
| 4117 | |
| 4118 // Note: a subset of changes to ObjectMonitor::wait() | |
| 4119 // will need to be replicated in complete_exit above | |
| 4120 void ObjectMonitor::wait(jlong millis, bool interruptible, TRAPS) { | |
| 4121 Thread * const Self = THREAD ; | |
| 4122 assert(Self->is_Java_thread(), "Must be Java thread!"); | |
| 4123 JavaThread *jt = (JavaThread *)THREAD; | |
| 4124 | |
| 4125 DeferredInitialize () ; | |
| 4126 | |
| 4127 // Throw IMSX or IEX. | |
| 4128 CHECK_OWNER(); | |
| 4129 | |
| 4130 // check for a pending interrupt | |
| 4131 if (interruptible && Thread::is_interrupted(Self, true) && !HAS_PENDING_EXCEPTION) { | |
| 4132 // post monitor waited event. Note that this is past-tense, we are done waiting. | |
| 4133 if (JvmtiExport::should_post_monitor_waited()) { | |
| 4134 // Note: 'false' parameter is passed here because the | |
| 4135 // wait was not timed out due to thread interrupt. | |
| 4136 JvmtiExport::post_monitor_waited(jt, this, false); | |
| 4137 } | |
| 4138 TEVENT (Wait - Throw IEX) ; | |
| 4139 THROW(vmSymbols::java_lang_InterruptedException()); | |
| 4140 return ; | |
| 4141 } | |
| 4142 TEVENT (Wait) ; | |
| 4143 | |
| 4144 assert (Self->_Stalled == 0, "invariant") ; | |
| 4145 Self->_Stalled = intptr_t(this) ; | |
| 4146 jt->set_current_waiting_monitor(this); | |
| 4147 | |
| 4148 // create a node to be put into the queue | |
| 4149 // Critically, after we reset() the event but prior to park(), we must check | |
| 4150 // for a pending interrupt. | |
| 4151 ObjectWaiter node(Self); | |
| 4152 node.TState = ObjectWaiter::TS_WAIT ; | |
| 4153 Self->_ParkEvent->reset() ; | |
| 4154 OrderAccess::fence(); // ST into Event; membar ; LD interrupted-flag | |
| 4155 | |
| 4156 // Enter the waiting queue, which is a circular doubly linked list in this case | |
| 4157 // but it could be a priority queue or any data structure. | |
| 4158 // _WaitSetLock protects the wait queue. Normally the wait queue is accessed only | |
| 4159 // by the the owner of the monitor *except* in the case where park() | |
| 4160 // returns because of a timeout of interrupt. Contention is exceptionally rare | |
| 4161 // so we use a simple spin-lock instead of a heavier-weight blocking lock. | |
| 4162 | |
| 4163 Thread::SpinAcquire (&_WaitSetLock, "WaitSet - add") ; | |
| 4164 AddWaiter (&node) ; | |
| 4165 Thread::SpinRelease (&_WaitSetLock) ; | |
| 4166 | |
| 4167 if ((SyncFlags & 4) == 0) { | |
| 4168 _Responsible = NULL ; | |
| 4169 } | |
| 4170 intptr_t save = _recursions; // record the old recursion count | |
| 4171 _waiters++; // increment the number of waiters | |
| 4172 _recursions = 0; // set the recursion level to be 1 | |
| 4173 exit (Self) ; // exit the monitor | |
| 4174 guarantee (_owner != Self, "invariant") ; | |
| 4175 | |
| 4176 // As soon as the ObjectMonitor's ownership is dropped in the exit() | |
| 4177 // call above, another thread can enter() the ObjectMonitor, do the | |
| 4178 // notify(), and exit() the ObjectMonitor. If the other thread's | |
| 4179 // exit() call chooses this thread as the successor and the unpark() | |
| 4180 // call happens to occur while this thread is posting a | |
| 4181 // MONITOR_CONTENDED_EXIT event, then we run the risk of the event | |
| 4182 // handler using RawMonitors and consuming the unpark(). | |
| 4183 // | |
| 4184 // To avoid the problem, we re-post the event. This does no harm | |
| 4185 // even if the original unpark() was not consumed because we are the | |
| 4186 // chosen successor for this monitor. | |
| 4187 if (node._notified != 0 && _succ == Self) { | |
| 4188 node._event->unpark(); | |
| 4189 } | |
| 4190 | |
| 4191 // The thread is on the WaitSet list - now park() it. | |
| 4192 // On MP systems it's conceivable that a brief spin before we park | |
| 4193 // could be profitable. | |
| 4194 // | |
| 4195 // TODO-FIXME: change the following logic to a loop of the form | |
| 4196 // while (!timeout && !interrupted && _notified == 0) park() | |
| 4197 | |
| 4198 int ret = OS_OK ; | |
| 4199 int WasNotified = 0 ; | |
| 4200 { // State transition wrappers | |
| 4201 OSThread* osthread = Self->osthread(); | |
| 4202 OSThreadWaitState osts(osthread, true); | |
| 4203 { | |
| 4204 ThreadBlockInVM tbivm(jt); | |
| 4205 // Thread is in thread_blocked state and oop access is unsafe. | |
| 4206 jt->set_suspend_equivalent(); | |
| 4207 | |
| 4208 if (interruptible && (Thread::is_interrupted(THREAD, false) || HAS_PENDING_EXCEPTION)) { | |
| 4209 // Intentionally empty | |
| 4210 } else | |
| 4211 if (node._notified == 0) { | |
| 4212 if (millis <= 0) { | |
| 4213 Self->_ParkEvent->park () ; | |
| 4214 } else { | |
| 4215 ret = Self->_ParkEvent->park (millis) ; | |
| 4216 } | |
| 4217 } | |
| 4218 | |
| 4219 // were we externally suspended while we were waiting? | |
| 4220 if (ExitSuspendEquivalent (jt)) { | |
| 4221 // TODO-FIXME: add -- if succ == Self then succ = null. | |
| 4222 jt->java_suspend_self(); | |
| 4223 } | |
| 4224 | |
| 4225 } // Exit thread safepoint: transition _thread_blocked -> _thread_in_vm | |
| 4226 | |
| 4227 | |
| 4228 // Node may be on the WaitSet, the EntryList (or cxq), or in transition | |
| 4229 // from the WaitSet to the EntryList. | |
| 4230 // See if we need to remove Node from the WaitSet. | |
| 4231 // We use double-checked locking to avoid grabbing _WaitSetLock | |
| 4232 // if the thread is not on the wait queue. | |
| 4233 // | |
| 4234 // Note that we don't need a fence before the fetch of TState. | |
| 4235 // In the worst case we'll fetch a old-stale value of TS_WAIT previously | |
| 4236 // written by the is thread. (perhaps the fetch might even be satisfied | |
| 4237 // by a look-aside into the processor's own store buffer, although given | |
| 4238 // the length of the code path between the prior ST and this load that's | |
| 4239 // highly unlikely). If the following LD fetches a stale TS_WAIT value | |
| 4240 // then we'll acquire the lock and then re-fetch a fresh TState value. | |
| 4241 // That is, we fail toward safety. | |
| 4242 | |
| 4243 if (node.TState == ObjectWaiter::TS_WAIT) { | |
| 4244 Thread::SpinAcquire (&_WaitSetLock, "WaitSet - unlink") ; | |
| 4245 if (node.TState == ObjectWaiter::TS_WAIT) { | |
| 4246 DequeueSpecificWaiter (&node) ; // unlink from WaitSet | |
| 4247 assert(node._notified == 0, "invariant"); | |
| 4248 node.TState = ObjectWaiter::TS_RUN ; | |
| 4249 } | |
| 4250 Thread::SpinRelease (&_WaitSetLock) ; | |
| 4251 } | |
| 4252 | |
| 4253 // The thread is now either on off-list (TS_RUN), | |
| 4254 // on the EntryList (TS_ENTER), or on the cxq (TS_CXQ). | |
| 4255 // The Node's TState variable is stable from the perspective of this thread. | |
| 4256 // No other threads will asynchronously modify TState. | |
| 4257 guarantee (node.TState != ObjectWaiter::TS_WAIT, "invariant") ; | |
| 4258 OrderAccess::loadload() ; | |
| 4259 if (_succ == Self) _succ = NULL ; | |
| 4260 WasNotified = node._notified ; | |
| 4261 | |
| 4262 // Reentry phase -- reacquire the monitor. | |
| 4263 // re-enter contended monitor after object.wait(). | |
| 4264 // retain OBJECT_WAIT state until re-enter successfully completes | |
| 4265 // Thread state is thread_in_vm and oop access is again safe, | |
| 4266 // although the raw address of the object may have changed. | |
| 4267 // (Don't cache naked oops over safepoints, of course). | |
| 4268 | |
| 4269 // post monitor waited event. Note that this is past-tense, we are done waiting. | |
| 4270 if (JvmtiExport::should_post_monitor_waited()) { | |
| 4271 JvmtiExport::post_monitor_waited(jt, this, ret == OS_TIMEOUT); | |
| 4272 } | |
| 4273 OrderAccess::fence() ; | |
| 4274 | |
| 4275 assert (Self->_Stalled != 0, "invariant") ; | |
| 4276 Self->_Stalled = 0 ; | |
| 4277 | |
| 4278 assert (_owner != Self, "invariant") ; | |
| 4279 ObjectWaiter::TStates v = node.TState ; | |
| 4280 if (v == ObjectWaiter::TS_RUN) { | |
| 4281 enter (Self) ; | |
| 4282 } else { | |
| 4283 guarantee (v == ObjectWaiter::TS_ENTER || v == ObjectWaiter::TS_CXQ, "invariant") ; | |
| 4284 ReenterI (Self, &node) ; | |
| 4285 node.wait_reenter_end(this); | |
| 4286 } | |
| 4287 | |
| 4288 // Self has reacquired the lock. | |
| 4289 // Lifecycle - the node representing Self must not appear on any queues. | |
| 4290 // Node is about to go out-of-scope, but even if it were immortal we wouldn't | |
| 4291 // want residual elements associated with this thread left on any lists. | |
| 4292 guarantee (node.TState == ObjectWaiter::TS_RUN, "invariant") ; | |
| 4293 assert (_owner == Self, "invariant") ; | |
| 4294 assert (_succ != Self , "invariant") ; | |
| 4295 } // OSThreadWaitState() | |
| 4296 | |
| 4297 jt->set_current_waiting_monitor(NULL); | |
| 4298 | |
| 4299 guarantee (_recursions == 0, "invariant") ; | |
| 4300 _recursions = save; // restore the old recursion count | |
| 4301 _waiters--; // decrement the number of waiters | |
| 4302 | |
| 4303 // Verify a few postconditions | |
| 4304 assert (_owner == Self , "invariant") ; | |
| 4305 assert (_succ != Self , "invariant") ; | |
| 4306 assert (((oop)(object()))->mark() == markOopDesc::encode(this), "invariant") ; | |
| 4307 | |
| 4308 if (SyncFlags & 32) { | |
| 4309 OrderAccess::fence() ; | |
| 4310 } | |
| 4311 | |
| 4312 // check if the notification happened | |
| 4313 if (!WasNotified) { | |
| 4314 // no, it could be timeout or Thread.interrupt() or both | |
| 4315 // check for interrupt event, otherwise it is timeout | |
| 4316 if (interruptible && Thread::is_interrupted(Self, true) && !HAS_PENDING_EXCEPTION) { | |
| 4317 TEVENT (Wait - throw IEX from epilog) ; | |
| 4318 THROW(vmSymbols::java_lang_InterruptedException()); | |
| 4319 } | |
| 4320 } | |
| 4321 | |
| 4322 // NOTE: Spurious wake up will be consider as timeout. | |
| 4323 // Monitor notify has precedence over thread interrupt. | |
| 4324 } | |
| 4325 | |
| 4326 | |
| 4327 // Consider: | |
| 4328 // If the lock is cool (cxq == null && succ == null) and we're on an MP system | |
| 4329 // then instead of transferring a thread from the WaitSet to the EntryList | |
| 4330 // we might just dequeue a thread from the WaitSet and directly unpark() it. | |
| 4331 | |
| 4332 void ObjectMonitor::notify(TRAPS) { | |
| 4333 CHECK_OWNER(); | |
| 4334 if (_WaitSet == NULL) { | |
| 4335 TEVENT (Empty-Notify) ; | |
| 4336 return ; | |
| 4337 } | |
| 4338 DTRACE_MONITOR_PROBE(notify, this, object(), THREAD); | |
| 4339 | |
| 4340 int Policy = Knob_MoveNotifyee ; | |
| 4341 | |
| 4342 Thread::SpinAcquire (&_WaitSetLock, "WaitSet - notify") ; | |
| 4343 ObjectWaiter * iterator = DequeueWaiter() ; | |
| 4344 if (iterator != NULL) { | |
| 4345 TEVENT (Notify1 - Transfer) ; | |
| 4346 guarantee (iterator->TState == ObjectWaiter::TS_WAIT, "invariant") ; | |
| 4347 guarantee (iterator->_notified == 0, "invariant") ; | |
| 4348 // Disposition - what might we do with iterator ? | |
| 4349 // a. add it directly to the EntryList - either tail or head. | |
| 4350 // b. push it onto the front of the _cxq. | |
| 4351 // For now we use (a). | |
| 4352 if (Policy != 4) { | |
| 4353 iterator->TState = ObjectWaiter::TS_ENTER ; | |
| 4354 } | |
| 4355 iterator->_notified = 1 ; | |
| 4356 | |
| 4357 ObjectWaiter * List = _EntryList ; | |
| 4358 if (List != NULL) { | |
| 4359 assert (List->_prev == NULL, "invariant") ; | |
| 4360 assert (List->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 4361 assert (List != iterator, "invariant") ; | |
| 4362 } | |
| 4363 | |
| 4364 if (Policy == 0) { // prepend to EntryList | |
| 4365 if (List == NULL) { | |
| 4366 iterator->_next = iterator->_prev = NULL ; | |
| 4367 _EntryList = iterator ; | |
| 4368 } else { | |
| 4369 List->_prev = iterator ; | |
| 4370 iterator->_next = List ; | |
| 4371 iterator->_prev = NULL ; | |
| 4372 _EntryList = iterator ; | |
| 4373 } | |
| 4374 } else | |
| 4375 if (Policy == 1) { // append to EntryList | |
| 4376 if (List == NULL) { | |
| 4377 iterator->_next = iterator->_prev = NULL ; | |
| 4378 _EntryList = iterator ; | |
| 4379 } else { | |
| 4380 // CONSIDER: finding the tail currently requires a linear-time walk of | |
| 4381 // the EntryList. We can make tail access constant-time by converting to | |
| 4382 // a CDLL instead of using our current DLL. | |
| 4383 ObjectWaiter * Tail ; | |
| 4384 for (Tail = List ; Tail->_next != NULL ; Tail = Tail->_next) ; | |
| 4385 assert (Tail != NULL && Tail->_next == NULL, "invariant") ; | |
| 4386 Tail->_next = iterator ; | |
| 4387 iterator->_prev = Tail ; | |
| 4388 iterator->_next = NULL ; | |
| 4389 } | |
| 4390 } else | |
| 4391 if (Policy == 2) { // prepend to cxq | |
| 4392 // prepend to cxq | |
| 4393 if (List == NULL) { | |
| 4394 iterator->_next = iterator->_prev = NULL ; | |
| 4395 _EntryList = iterator ; | |
| 4396 } else { | |
| 4397 iterator->TState = ObjectWaiter::TS_CXQ ; | |
| 4398 for (;;) { | |
| 4399 ObjectWaiter * Front = _cxq ; | |
| 4400 iterator->_next = Front ; | |
| 4401 if (Atomic::cmpxchg_ptr (iterator, &_cxq, Front) == Front) { | |
| 4402 break ; | |
| 4403 } | |
| 4404 } | |
| 4405 } | |
| 4406 } else | |
| 4407 if (Policy == 3) { // append to cxq | |
| 4408 iterator->TState = ObjectWaiter::TS_CXQ ; | |
| 4409 for (;;) { | |
| 4410 ObjectWaiter * Tail ; | |
| 4411 Tail = _cxq ; | |
| 4412 if (Tail == NULL) { | |
| 4413 iterator->_next = NULL ; | |
| 4414 if (Atomic::cmpxchg_ptr (iterator, &_cxq, NULL) == NULL) { | |
| 4415 break ; | |
| 4416 } | |
| 4417 } else { | |
| 4418 while (Tail->_next != NULL) Tail = Tail->_next ; | |
| 4419 Tail->_next = iterator ; | |
| 4420 iterator->_prev = Tail ; | |
| 4421 iterator->_next = NULL ; | |
| 4422 break ; | |
| 4423 } | |
| 4424 } | |
| 4425 } else { | |
| 4426 ParkEvent * ev = iterator->_event ; | |
| 4427 iterator->TState = ObjectWaiter::TS_RUN ; | |
| 4428 OrderAccess::fence() ; | |
| 4429 ev->unpark() ; | |
| 4430 } | |
| 4431 | |
| 4432 if (Policy < 4) { | |
| 4433 iterator->wait_reenter_begin(this); | |
| 4434 } | |
| 4435 | |
| 4436 // _WaitSetLock protects the wait queue, not the EntryList. We could | |
| 4437 // move the add-to-EntryList operation, above, outside the critical section | |
| 4438 // protected by _WaitSetLock. In practice that's not useful. With the | |
| 4439 // exception of wait() timeouts and interrupts the monitor owner | |
| 4440 // is the only thread that grabs _WaitSetLock. There's almost no contention | |
| 4441 // on _WaitSetLock so it's not profitable to reduce the length of the | |
| 4442 // critical section. | |
| 4443 } | |
| 4444 | |
| 4445 Thread::SpinRelease (&_WaitSetLock) ; | |
| 4446 | |
| 4447 if (iterator != NULL && ObjectSynchronizer::_sync_Notifications != NULL) { | |
| 4448 ObjectSynchronizer::_sync_Notifications->inc() ; | |
| 4449 } | |
| 4450 } | |
| 4451 | |
| 4452 | |
| 4453 void ObjectMonitor::notifyAll(TRAPS) { | |
| 4454 CHECK_OWNER(); | |
| 4455 ObjectWaiter* iterator; | |
| 4456 if (_WaitSet == NULL) { | |
| 4457 TEVENT (Empty-NotifyAll) ; | |
| 4458 return ; | |
| 4459 } | |
| 4460 DTRACE_MONITOR_PROBE(notifyAll, this, object(), THREAD); | |
| 4461 | |
| 4462 int Policy = Knob_MoveNotifyee ; | |
| 4463 int Tally = 0 ; | |
| 4464 Thread::SpinAcquire (&_WaitSetLock, "WaitSet - notifyall") ; | |
| 4465 | |
| 4466 for (;;) { | |
| 4467 iterator = DequeueWaiter () ; | |
| 4468 if (iterator == NULL) break ; | |
| 4469 TEVENT (NotifyAll - Transfer1) ; | |
| 4470 ++Tally ; | |
| 4471 | |
| 4472 // Disposition - what might we do with iterator ? | |
| 4473 // a. add it directly to the EntryList - either tail or head. | |
| 4474 // b. push it onto the front of the _cxq. | |
| 4475 // For now we use (a). | |
| 4476 // | |
| 4477 // TODO-FIXME: currently notifyAll() transfers the waiters one-at-a-time from the waitset | |
| 4478 // to the EntryList. This could be done more efficiently with a single bulk transfer, | |
| 4479 // but in practice it's not time-critical. Beware too, that in prepend-mode we invert the | |
| 4480 // order of the waiters. Lets say that the waitset is "ABCD" and the EntryList is "XYZ". | |
| 4481 // After a notifyAll() in prepend mode the waitset will be empty and the EntryList will | |
| 4482 // be "DCBAXYZ". | |
| 4483 | |
| 4484 guarantee (iterator->TState == ObjectWaiter::TS_WAIT, "invariant") ; | |
| 4485 guarantee (iterator->_notified == 0, "invariant") ; | |
| 4486 iterator->_notified = 1 ; | |
| 4487 if (Policy != 4) { | |
| 4488 iterator->TState = ObjectWaiter::TS_ENTER ; | |
| 4489 } | |
| 4490 | |
| 4491 ObjectWaiter * List = _EntryList ; | |
| 4492 if (List != NULL) { | |
| 4493 assert (List->_prev == NULL, "invariant") ; | |
| 4494 assert (List->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 4495 assert (List != iterator, "invariant") ; | |
| 4496 } | |
| 4497 | |
| 4498 if (Policy == 0) { // prepend to EntryList | |
| 4499 if (List == NULL) { | |
| 4500 iterator->_next = iterator->_prev = NULL ; | |
| 4501 _EntryList = iterator ; | |
| 4502 } else { | |
| 4503 List->_prev = iterator ; | |
| 4504 iterator->_next = List ; | |
| 4505 iterator->_prev = NULL ; | |
| 4506 _EntryList = iterator ; | |
| 4507 } | |
| 4508 } else | |
| 4509 if (Policy == 1) { // append to EntryList | |
| 4510 if (List == NULL) { | |
| 4511 iterator->_next = iterator->_prev = NULL ; | |
| 4512 _EntryList = iterator ; | |
| 4513 } else { | |
| 4514 // CONSIDER: finding the tail currently requires a linear-time walk of | |
| 4515 // the EntryList. We can make tail access constant-time by converting to | |
| 4516 // a CDLL instead of using our current DLL. | |
| 4517 ObjectWaiter * Tail ; | |
| 4518 for (Tail = List ; Tail->_next != NULL ; Tail = Tail->_next) ; | |
| 4519 assert (Tail != NULL && Tail->_next == NULL, "invariant") ; | |
| 4520 Tail->_next = iterator ; | |
| 4521 iterator->_prev = Tail ; | |
| 4522 iterator->_next = NULL ; | |
| 4523 } | |
| 4524 } else | |
| 4525 if (Policy == 2) { // prepend to cxq | |
| 4526 // prepend to cxq | |
| 4527 iterator->TState = ObjectWaiter::TS_CXQ ; | |
| 4528 for (;;) { | |
| 4529 ObjectWaiter * Front = _cxq ; | |
| 4530 iterator->_next = Front ; | |
| 4531 if (Atomic::cmpxchg_ptr (iterator, &_cxq, Front) == Front) { | |
| 4532 break ; | |
| 4533 } | |
| 4534 } | |
| 4535 } else | |
| 4536 if (Policy == 3) { // append to cxq | |
| 4537 iterator->TState = ObjectWaiter::TS_CXQ ; | |
| 4538 for (;;) { | |
| 4539 ObjectWaiter * Tail ; | |
| 4540 Tail = _cxq ; | |
| 4541 if (Tail == NULL) { | |
| 4542 iterator->_next = NULL ; | |
| 4543 if (Atomic::cmpxchg_ptr (iterator, &_cxq, NULL) == NULL) { | |
| 4544 break ; | |
| 4545 } | |
| 4546 } else { | |
| 4547 while (Tail->_next != NULL) Tail = Tail->_next ; | |
| 4548 Tail->_next = iterator ; | |
| 4549 iterator->_prev = Tail ; | |
| 4550 iterator->_next = NULL ; | |
| 4551 break ; | |
| 4552 } | |
| 4553 } | |
| 4554 } else { | |
| 4555 ParkEvent * ev = iterator->_event ; | |
| 4556 iterator->TState = ObjectWaiter::TS_RUN ; | |
| 4557 OrderAccess::fence() ; | |
| 4558 ev->unpark() ; | |
| 4559 } | |
| 4560 | |
| 4561 if (Policy < 4) { | |
| 4562 iterator->wait_reenter_begin(this); | |
| 4563 } | |
| 4564 | |
| 4565 // _WaitSetLock protects the wait queue, not the EntryList. We could | |
| 4566 // move the add-to-EntryList operation, above, outside the critical section | |
| 4567 // protected by _WaitSetLock. In practice that's not useful. With the | |
| 4568 // exception of wait() timeouts and interrupts the monitor owner | |
| 4569 // is the only thread that grabs _WaitSetLock. There's almost no contention | |
| 4570 // on _WaitSetLock so it's not profitable to reduce the length of the | |
| 4571 // critical section. | |
| 4572 } | |
| 4573 | |
| 4574 Thread::SpinRelease (&_WaitSetLock) ; | |
| 4575 | |
| 4576 if (Tally != 0 && ObjectSynchronizer::_sync_Notifications != NULL) { | |
| 4577 ObjectSynchronizer::_sync_Notifications->inc(Tally) ; | |
| 4578 } | |
| 4579 } | |
| 4580 | |
| 4581 // check_slow() is a misnomer. It's called to simply to throw an IMSX exception. | |
| 4582 // TODO-FIXME: remove check_slow() -- it's likely dead. | |
| 4583 | |
| 4584 void ObjectMonitor::check_slow(TRAPS) { | |
| 4585 TEVENT (check_slow - throw IMSX) ; | |
| 4586 assert(THREAD != _owner && !THREAD->is_lock_owned((address) _owner), "must not be owner"); | |
| 4587 THROW_MSG(vmSymbols::java_lang_IllegalMonitorStateException(), "current thread not owner"); | |
| 4588 } | |
| 4589 | |
| 4590 | |
| 4591 // ------------------------------------------------------------------------- | |
| 4592 // The raw monitor subsystem is entirely distinct from normal | |
| 4593 // java-synchronization or jni-synchronization. raw monitors are not | |
| 4594 // associated with objects. They can be implemented in any manner | |
| 4595 // that makes sense. The original implementors decided to piggy-back | |
| 4596 // the raw-monitor implementation on the existing Java objectMonitor mechanism. | |
| 4597 // This flaw needs to fixed. We should reimplement raw monitors as sui-generis. | |
| 4598 // Specifically, we should not implement raw monitors via java monitors. | |
| 4599 // Time permitting, we should disentangle and deconvolve the two implementations | |
| 4600 // and move the resulting raw monitor implementation over to the JVMTI directories. | |
| 4601 // Ideally, the raw monitor implementation would be built on top of | |
| 4602 // park-unpark and nothing else. | |
| 4603 // | |
| 4604 // raw monitors are used mainly by JVMTI | |
| 4605 // The raw monitor implementation borrows the ObjectMonitor structure, | |
| 4606 // but the operators are degenerate and extremely simple. | |
| 4607 // | |
| 4608 // Mixed use of a single objectMonitor instance -- as both a raw monitor | |
| 4609 // and a normal java monitor -- is not permissible. | |
| 4610 // | |
| 4611 // Note that we use the single RawMonitor_lock to protect queue operations for | |
| 4612 // _all_ raw monitors. This is a scalability impediment, but since raw monitor usage | |
| 4613 // is deprecated and rare, this is not of concern. The RawMonitor_lock can not | |
| 4614 // be held indefinitely. The critical sections must be short and bounded. | |
| 4615 // | |
| 4616 // ------------------------------------------------------------------------- | |
| 4617 | |
| 4618 int ObjectMonitor::SimpleEnter (Thread * Self) { | |
| 4619 for (;;) { | |
| 4620 if (Atomic::cmpxchg_ptr (Self, &_owner, NULL) == NULL) { | |
| 4621 return OS_OK ; | |
| 4622 } | |
| 4623 | |
| 4624 ObjectWaiter Node (Self) ; | |
| 4625 Self->_ParkEvent->reset() ; // strictly optional | |
| 4626 Node.TState = ObjectWaiter::TS_ENTER ; | |
| 4627 | |
| 4628 RawMonitor_lock->lock_without_safepoint_check() ; | |
| 4629 Node._next = _EntryList ; | |
| 4630 _EntryList = &Node ; | |
| 4631 OrderAccess::fence() ; | |
| 4632 if (_owner == NULL && Atomic::cmpxchg_ptr (Self, &_owner, NULL) == NULL) { | |
| 4633 _EntryList = Node._next ; | |
| 4634 RawMonitor_lock->unlock() ; | |
| 4635 return OS_OK ; | |
| 4636 } | |
| 4637 RawMonitor_lock->unlock() ; | |
| 4638 while (Node.TState == ObjectWaiter::TS_ENTER) { | |
| 4639 Self->_ParkEvent->park() ; | |
| 4640 } | |
| 4641 } | |
| 4642 } | |
| 4643 | |
| 4644 int ObjectMonitor::SimpleExit (Thread * Self) { | |
| 4645 guarantee (_owner == Self, "invariant") ; | |
| 4646 OrderAccess::release_store_ptr (&_owner, NULL) ; | |
| 4647 OrderAccess::fence() ; | |
| 4648 if (_EntryList == NULL) return OS_OK ; | |
| 4649 ObjectWaiter * w ; | |
| 4650 | |
| 4651 RawMonitor_lock->lock_without_safepoint_check() ; | |
| 4652 w = _EntryList ; | |
| 4653 if (w != NULL) { | |
| 4654 _EntryList = w->_next ; | |
| 4655 } | |
| 4656 RawMonitor_lock->unlock() ; | |
| 4657 if (w != NULL) { | |
| 4658 guarantee (w ->TState == ObjectWaiter::TS_ENTER, "invariant") ; | |
| 4659 ParkEvent * ev = w->_event ; | |
| 4660 w->TState = ObjectWaiter::TS_RUN ; | |
| 4661 OrderAccess::fence() ; | |
| 4662 ev->unpark() ; | |
| 4663 } | |
| 4664 return OS_OK ; | |
| 4665 } | |
| 4666 | |
| 4667 int ObjectMonitor::SimpleWait (Thread * Self, jlong millis) { | |
| 4668 guarantee (_owner == Self , "invariant") ; | |
| 4669 guarantee (_recursions == 0, "invariant") ; | |
| 4670 | |
| 4671 ObjectWaiter Node (Self) ; | |
| 4672 Node._notified = 0 ; | |
| 4673 Node.TState = ObjectWaiter::TS_WAIT ; | |
| 4674 | |
| 4675 RawMonitor_lock->lock_without_safepoint_check() ; | |
| 4676 Node._next = _WaitSet ; | |
| 4677 _WaitSet = &Node ; | |
| 4678 RawMonitor_lock->unlock() ; | |
| 4679 | |
| 4680 SimpleExit (Self) ; | |
| 4681 guarantee (_owner != Self, "invariant") ; | |
| 4682 | |
| 4683 int ret = OS_OK ; | |
| 4684 if (millis <= 0) { | |
| 4685 Self->_ParkEvent->park(); | |
| 4686 } else { | |
| 4687 ret = Self->_ParkEvent->park(millis); | |
| 4688 } | |
| 4689 | |
| 4690 // If thread still resides on the waitset then unlink it. | |
| 4691 // Double-checked locking -- the usage is safe in this context | |
| 4692 // as we TState is volatile and the lock-unlock operators are | |
| 4693 // serializing (barrier-equivalent). | |
| 4694 | |
| 4695 if (Node.TState == ObjectWaiter::TS_WAIT) { | |
| 4696 RawMonitor_lock->lock_without_safepoint_check() ; | |
| 4697 if (Node.TState == ObjectWaiter::TS_WAIT) { | |
| 4698 // Simple O(n) unlink, but performance isn't critical here. | |
| 4699 ObjectWaiter * p ; | |
| 4700 ObjectWaiter * q = NULL ; | |
| 4701 for (p = _WaitSet ; p != &Node; p = p->_next) { | |
| 4702 q = p ; | |
| 4703 } | |
| 4704 guarantee (p == &Node, "invariant") ; | |
| 4705 if (q == NULL) { | |
| 4706 guarantee (p == _WaitSet, "invariant") ; | |
| 4707 _WaitSet = p->_next ; | |
| 4708 } else { | |
| 4709 guarantee (p == q->_next, "invariant") ; | |
| 4710 q->_next = p->_next ; | |
| 4711 } | |
| 4712 Node.TState = ObjectWaiter::TS_RUN ; | |
| 4713 } | |
| 4714 RawMonitor_lock->unlock() ; | |
| 4715 } | |
| 4716 | |
| 4717 guarantee (Node.TState == ObjectWaiter::TS_RUN, "invariant") ; | |
| 4718 SimpleEnter (Self) ; | |
| 4719 | |
| 4720 guarantee (_owner == Self, "invariant") ; | |
| 4721 guarantee (_recursions == 0, "invariant") ; | |
| 4722 return ret ; | |
| 4723 } | |
| 4724 | |
| 4725 int ObjectMonitor::SimpleNotify (Thread * Self, bool All) { | |
| 4726 guarantee (_owner == Self, "invariant") ; | |
| 4727 if (_WaitSet == NULL) return OS_OK ; | |
| 4728 | |
| 4729 // We have two options: | |
| 4730 // A. Transfer the threads from the WaitSet to the EntryList | |
| 4731 // B. Remove the thread from the WaitSet and unpark() it. | |
| 4732 // | |
| 4733 // We use (B), which is crude and results in lots of futile | |
| 4734 // context switching. In particular (B) induces lots of contention. | |
| 4735 | |
| 4736 ParkEvent * ev = NULL ; // consider using a small auto array ... | |
| 4737 RawMonitor_lock->lock_without_safepoint_check() ; | |
| 4738 for (;;) { | |
| 4739 ObjectWaiter * w = _WaitSet ; | |
| 4740 if (w == NULL) break ; | |
| 4741 _WaitSet = w->_next ; | |
| 4742 if (ev != NULL) { ev->unpark(); ev = NULL; } | |
| 4743 ev = w->_event ; | |
| 4744 OrderAccess::loadstore() ; | |
| 4745 w->TState = ObjectWaiter::TS_RUN ; | |
| 4746 OrderAccess::storeload(); | |
| 4747 if (!All) break ; | |
| 4748 } | |
| 4749 RawMonitor_lock->unlock() ; | |
| 4750 if (ev != NULL) ev->unpark(); | |
| 4751 return OS_OK ; | |
| 4752 } | |
| 4753 | |
| 4754 // Any JavaThread will enter here with state _thread_blocked | |
| 4755 int ObjectMonitor::raw_enter(TRAPS) { | |
| 4756 TEVENT (raw_enter) ; | |
| 4757 void * Contended ; | |
| 4758 | |
| 4759 // don't enter raw monitor if thread is being externally suspended, it will | |
| 4760 // surprise the suspender if a "suspended" thread can still enter monitor | |
| 4761 JavaThread * jt = (JavaThread *)THREAD; | |
| 4762 if (THREAD->is_Java_thread()) { | |
| 4763 jt->SR_lock()->lock_without_safepoint_check(); | |
| 4764 while (jt->is_external_suspend()) { | |
| 4765 jt->SR_lock()->unlock(); | |
| 4766 jt->java_suspend_self(); | |
| 4767 jt->SR_lock()->lock_without_safepoint_check(); | |
| 4768 } | |
| 4769 // guarded by SR_lock to avoid racing with new external suspend requests. | |
| 4770 Contended = Atomic::cmpxchg_ptr (THREAD, &_owner, NULL) ; | |
| 4771 jt->SR_lock()->unlock(); | |
| 4772 } else { | |
| 4773 Contended = Atomic::cmpxchg_ptr (THREAD, &_owner, NULL) ; | |
| 4774 } | |
| 4775 | |
| 4776 if (Contended == THREAD) { | |
| 4777 _recursions ++ ; | |
| 4778 return OM_OK ; | |
| 4779 } | |
| 4780 | |
| 4781 if (Contended == NULL) { | |
| 4782 guarantee (_owner == THREAD, "invariant") ; | |
| 4783 guarantee (_recursions == 0, "invariant") ; | |
| 4784 return OM_OK ; | |
| 4785 } | |
| 4786 | |
| 4787 THREAD->set_current_pending_monitor(this); | |
| 4788 | |
| 4789 if (!THREAD->is_Java_thread()) { | |
| 4790 // No other non-Java threads besides VM thread would acquire | |
| 4791 // a raw monitor. | |
| 4792 assert(THREAD->is_VM_thread(), "must be VM thread"); | |
| 4793 SimpleEnter (THREAD) ; | |
| 4794 } else { | |
| 4795 guarantee (jt->thread_state() == _thread_blocked, "invariant") ; | |
| 4796 for (;;) { | |
| 4797 jt->set_suspend_equivalent(); | |
| 4798 // cleared by handle_special_suspend_equivalent_condition() or | |
| 4799 // java_suspend_self() | |
| 4800 SimpleEnter (THREAD) ; | |
| 4801 | |
| 4802 // were we externally suspended while we were waiting? | |
| 4803 if (!jt->handle_special_suspend_equivalent_condition()) break ; | |
| 4804 | |
| 4805 // This thread was externally suspended | |
| 4806 // | |
| 4807 // This logic isn't needed for JVMTI raw monitors, | |
| 4808 // but doesn't hurt just in case the suspend rules change. This | |
| 4809 // logic is needed for the ObjectMonitor.wait() reentry phase. | |
| 4810 // We have reentered the contended monitor, but while we were | |
| 4811 // waiting another thread suspended us. We don't want to reenter | |
| 4812 // the monitor while suspended because that would surprise the | |
| 4813 // thread that suspended us. | |
| 4814 // | |
| 4815 // Drop the lock - | |
| 4816 SimpleExit (THREAD) ; | |
| 4817 | |
| 4818 jt->java_suspend_self(); | |
| 4819 } | |
| 4820 | |
| 4821 assert(_owner == THREAD, "Fatal error with monitor owner!"); | |
| 4822 assert(_recursions == 0, "Fatal error with monitor recursions!"); | |
| 4823 } | |
| 4824 | |
| 4825 THREAD->set_current_pending_monitor(NULL); | |
| 4826 guarantee (_recursions == 0, "invariant") ; | |
| 4827 return OM_OK; | |
| 4828 } | |
| 4829 | |
| 4830 // Used mainly for JVMTI raw monitor implementation | |
| 4831 // Also used for ObjectMonitor::wait(). | |
| 4832 int ObjectMonitor::raw_exit(TRAPS) { | |
| 4833 TEVENT (raw_exit) ; | |
| 4834 if (THREAD != _owner) { | |
| 4835 return OM_ILLEGAL_MONITOR_STATE; | |
| 4836 } | |
| 4837 if (_recursions > 0) { | |
| 4838 --_recursions ; | |
| 4839 return OM_OK ; | |
| 4840 } | |
| 4841 | |
| 4842 void * List = _EntryList ; | |
| 4843 SimpleExit (THREAD) ; | |
| 4844 | |
| 4845 return OM_OK; | |
| 4846 } | |
| 4847 | |
| 4848 // Used for JVMTI raw monitor implementation. | |
| 4849 // All JavaThreads will enter here with state _thread_blocked | |
| 4850 | |
| 4851 int ObjectMonitor::raw_wait(jlong millis, bool interruptible, TRAPS) { | |
| 4852 TEVENT (raw_wait) ; | |
| 4853 if (THREAD != _owner) { | |
| 4854 return OM_ILLEGAL_MONITOR_STATE; | |
| 4855 } | |
| 4856 | |
| 4857 // To avoid spurious wakeups we reset the parkevent -- This is strictly optional. | |
| 4858 // The caller must be able to tolerate spurious returns from raw_wait(). | |
| 4859 THREAD->_ParkEvent->reset() ; | |
| 4860 OrderAccess::fence() ; | |
| 4861 | |
| 4862 // check interrupt event | |
| 4863 if (interruptible && Thread::is_interrupted(THREAD, true)) { | |
| 4864 return OM_INTERRUPTED; | |
| 4865 } | |
| 4866 | |
| 4867 intptr_t save = _recursions ; | |
| 4868 _recursions = 0 ; | |
| 4869 _waiters ++ ; | |
| 4870 if (THREAD->is_Java_thread()) { | |
| 4871 guarantee (((JavaThread *) THREAD)->thread_state() == _thread_blocked, "invariant") ; | |
| 4872 ((JavaThread *)THREAD)->set_suspend_equivalent(); | |
| 4873 } | |
| 4874 int rv = SimpleWait (THREAD, millis) ; | |
| 4875 _recursions = save ; | |
| 4876 _waiters -- ; | |
| 4877 | |
| 4878 guarantee (THREAD == _owner, "invariant") ; | |
| 4879 if (THREAD->is_Java_thread()) { | |
| 4880 JavaThread * jSelf = (JavaThread *) THREAD ; | |
| 4881 for (;;) { | |
| 4882 if (!jSelf->handle_special_suspend_equivalent_condition()) break ; | |
| 4883 SimpleExit (THREAD) ; | |
| 4884 jSelf->java_suspend_self(); | |
| 4885 SimpleEnter (THREAD) ; | |
| 4886 jSelf->set_suspend_equivalent() ; | |
| 4887 } | |
| 4888 } | |
| 4889 guarantee (THREAD == _owner, "invariant") ; | |
| 4890 | |
| 4891 if (interruptible && Thread::is_interrupted(THREAD, true)) { | |
| 4892 return OM_INTERRUPTED; | |
| 4893 } | |
| 4894 return OM_OK ; | |
| 4895 } | |
| 4896 | |
| 4897 int ObjectMonitor::raw_notify(TRAPS) { | |
| 4898 TEVENT (raw_notify) ; | |
| 4899 if (THREAD != _owner) { | |
| 4900 return OM_ILLEGAL_MONITOR_STATE; | |
| 4901 } | |
| 4902 SimpleNotify (THREAD, false) ; | |
| 4903 return OM_OK; | |
| 4904 } | |
| 4905 | |
| 4906 int ObjectMonitor::raw_notifyAll(TRAPS) { | |
| 4907 TEVENT (raw_notifyAll) ; | |
| 4908 if (THREAD != _owner) { | |
| 4909 return OM_ILLEGAL_MONITOR_STATE; | |
| 4910 } | |
| 4911 SimpleNotify (THREAD, true) ; | |
| 4912 return OM_OK; | |
| 4913 } | |
| 4914 | |
| 4915 #ifndef PRODUCT | |
| 4916 void ObjectMonitor::verify() { | |
| 4917 } | |
| 4918 | |
| 4919 void ObjectMonitor::print() { | |
| 4920 } | |
| 4921 #endif | |
| 4922 | |
| 4923 //------------------------------------------------------------------------------ | |
| 4924 // Non-product code | |
| 4925 | |
| 4926 #ifndef PRODUCT | |
| 4927 | |
| 4928 void ObjectSynchronizer::trace_locking(Handle locking_obj, bool is_compiled, | |
| 4929 bool is_method, bool is_locking) { | |
| 4930 // Don't know what to do here | |
| 4931 } | |
| 4932 | |
| 4933 // Verify all monitors in the monitor cache, the verification is weak. | |
| 4934 void ObjectSynchronizer::verify() { | |
| 4935 ObjectMonitor* block = gBlockList; | |
| 4936 ObjectMonitor* mid; | |
| 4937 while (block) { | |
| 4938 assert(block->object() == CHAINMARKER, "must be a block header"); | |
| 4939 for (int i = 1; i < _BLOCKSIZE; i++) { | |
| 4940 mid = block + i; | |
| 4941 oop object = (oop) mid->object(); | |
| 4942 if (object != NULL) { | |
| 4943 mid->verify(); | |
| 4944 } | |
| 4945 } | |
| 4946 block = (ObjectMonitor*) block->FreeNext; | |
| 4947 } | |
| 4948 } | |
| 4949 | |
| 4950 // Check if monitor belongs to the monitor cache | |
| 4951 // The list is grow-only so it's *relatively* safe to traverse | |
| 4952 // the list of extant blocks without taking a lock. | |
| 4953 | |
| 4954 int ObjectSynchronizer::verify_objmon_isinpool(ObjectMonitor *monitor) { | |
| 4955 ObjectMonitor* block = gBlockList; | |
| 4956 | |
| 4957 while (block) { | |
| 4958 assert(block->object() == CHAINMARKER, "must be a block header"); | |
| 4959 if (monitor > &block[0] && monitor < &block[_BLOCKSIZE]) { | |
| 4960 address mon = (address) monitor; | |
| 4961 address blk = (address) block; | |
| 4962 size_t diff = mon - blk; | |
| 4963 assert((diff % sizeof(ObjectMonitor)) == 0, "check"); | |
| 4964 return 1; | |
| 4965 } | |
| 4966 block = (ObjectMonitor*) block->FreeNext; | |
| 4967 } | |
| 4968 return 0; | |
| 4969 } | |
| 4970 | |
| 4971 #endif |