Mercurial > hg > graal-compiler
annotate src/share/vm/runtime/mutex.cpp @ 20197:ce8f6bb717c9
8042195: Introduce umbrella header orderAccess.inline.hpp.
Reviewed-by: dholmes, kvn, stefank, twisti
| author | goetz |
|---|---|
| date | Tue, 29 Apr 2014 15:17:27 +0200 |
| parents | 78bbf4d43a14 |
| children | 7848fc12602b |
| rev | line source |
|---|---|
| 0 | 1 |
| 2 /* | |
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3 * Copyright (c) 1998, 2014, Oracle and/or its affiliates. All rights reserved. |
| 0 | 4 * DO NOT ALTER OR REMOVE COPYRIGHT NOTICES OR THIS FILE HEADER. |
| 5 * | |
| 6 * This code is free software; you can redistribute it and/or modify it | |
| 7 * under the terms of the GNU General Public License version 2 only, as | |
| 8 * published by the Free Software Foundation. | |
| 9 * | |
| 10 * This code is distributed in the hope that it will be useful, but WITHOUT | |
| 11 * ANY WARRANTY; without even the implied warranty of MERCHANTABILITY or | |
| 12 * FITNESS FOR A PARTICULAR PURPOSE. See the GNU General Public License | |
| 13 * version 2 for more details (a copy is included in the LICENSE file that | |
| 14 * accompanied this code). | |
| 15 * | |
| 16 * You should have received a copy of the GNU General Public License version | |
| 17 * 2 along with this work; if not, write to the Free Software Foundation, | |
| 18 * Inc., 51 Franklin St, Fifth Floor, Boston, MA 02110-1301 USA. | |
| 19 * | |
|
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20 * Please contact Oracle, 500 Oracle Parkway, Redwood Shores, CA 94065 USA |
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21 * or visit www.oracle.com if you need additional information or have any |
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22 * questions. |
| 0 | 23 * |
| 24 */ | |
| 25 | |
| 1972 | 26 #include "precompiled.hpp" |
| 27 #include "runtime/mutex.hpp" | |
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28 #include "runtime/orderAccess.inline.hpp" |
| 1972 | 29 #include "runtime/osThread.hpp" |
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30 #include "runtime/thread.inline.hpp" |
| 1972 | 31 #include "utilities/events.hpp" |
| 32 #ifdef TARGET_OS_FAMILY_linux | |
| 33 # include "mutex_linux.inline.hpp" | |
| 34 #endif | |
| 35 #ifdef TARGET_OS_FAMILY_solaris | |
| 36 # include "mutex_solaris.inline.hpp" | |
| 37 #endif | |
| 38 #ifdef TARGET_OS_FAMILY_windows | |
| 39 # include "mutex_windows.inline.hpp" | |
| 40 #endif | |
| 3960 | 41 #ifdef TARGET_OS_FAMILY_bsd |
| 42 # include "mutex_bsd.inline.hpp" | |
| 43 #endif | |
| 0 | 44 |
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45 PRAGMA_FORMAT_MUTE_WARNINGS_FOR_GCC |
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46 |
| 0 | 47 // o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o |
| 48 // | |
| 49 // Native Monitor-Mutex locking - theory of operations | |
| 50 // | |
| 51 // * Native Monitors are completely unrelated to Java-level monitors, | |
| 52 // although the "back-end" slow-path implementations share a common lineage. | |
| 53 // See objectMonitor:: in synchronizer.cpp. | |
| 54 // Native Monitors do *not* support nesting or recursion but otherwise | |
| 55 // they're basically Hoare-flavor monitors. | |
| 56 // | |
| 57 // * A thread acquires ownership of a Monitor/Mutex by CASing the LockByte | |
| 58 // in the _LockWord from zero to non-zero. Note that the _Owner field | |
| 59 // is advisory and is used only to verify that the thread calling unlock() | |
| 60 // is indeed the last thread to have acquired the lock. | |
| 61 // | |
| 62 // * Contending threads "push" themselves onto the front of the contention | |
| 63 // queue -- called the cxq -- with CAS and then spin/park. | |
| 64 // The _LockWord contains the LockByte as well as the pointer to the head | |
| 65 // of the cxq. Colocating the LockByte with the cxq precludes certain races. | |
| 66 // | |
| 67 // * Using a separately addressable LockByte allows for CAS:MEMBAR or CAS:0 | |
| 68 // idioms. We currently use MEMBAR in the uncontended unlock() path, as | |
| 69 // MEMBAR often has less latency than CAS. If warranted, we could switch to | |
| 70 // a CAS:0 mode, using timers to close the resultant race, as is done | |
| 71 // with Java Monitors in synchronizer.cpp. | |
| 72 // | |
| 73 // See the following for a discussion of the relative cost of atomics (CAS) | |
| 74 // MEMBAR, and ways to eliminate such instructions from the common-case paths: | |
| 75 // -- http://blogs.sun.com/dave/entry/biased_locking_in_hotspot | |
| 76 // -- http://blogs.sun.com/dave/resource/MustangSync.pdf | |
| 77 // -- http://blogs.sun.com/dave/resource/synchronization-public2.pdf | |
| 78 // -- synchronizer.cpp | |
| 79 // | |
| 80 // * Overall goals - desiderata | |
| 81 // 1. Minimize context switching | |
| 82 // 2. Minimize lock migration | |
| 83 // 3. Minimize CPI -- affinity and locality | |
| 84 // 4. Minimize the execution of high-latency instructions such as CAS or MEMBAR | |
| 85 // 5. Minimize outer lock hold times | |
| 86 // 6. Behave gracefully on a loaded system | |
| 87 // | |
| 88 // * Thread flow and list residency: | |
| 89 // | |
| 90 // Contention queue --> EntryList --> OnDeck --> Owner --> !Owner | |
| 91 // [..resident on monitor list..] | |
| 92 // [...........contending..................] | |
| 93 // | |
| 94 // -- The contention queue (cxq) contains recently-arrived threads (RATs). | |
| 95 // Threads on the cxq eventually drain into the EntryList. | |
| 96 // -- Invariant: a thread appears on at most one list -- cxq, EntryList | |
| 97 // or WaitSet -- at any one time. | |
| 98 // -- For a given monitor there can be at most one "OnDeck" thread at any | |
| 99 // given time but if needbe this particular invariant could be relaxed. | |
| 100 // | |
| 101 // * The WaitSet and EntryList linked lists are composed of ParkEvents. | |
| 102 // I use ParkEvent instead of threads as ParkEvents are immortal and | |
| 103 // type-stable, meaning we can safely unpark() a possibly stale | |
| 104 // list element in the unlock()-path. (That's benign). | |
| 105 // | |
| 106 // * Succession policy - providing for progress: | |
| 107 // | |
| 108 // As necessary, the unlock()ing thread identifies, unlinks, and unparks | |
| 109 // an "heir presumptive" tentative successor thread from the EntryList. | |
| 110 // This becomes the so-called "OnDeck" thread, of which there can be only | |
| 111 // one at any given time for a given monitor. The wakee will recontend | |
| 112 // for ownership of monitor. | |
| 113 // | |
| 114 // Succession is provided for by a policy of competitive handoff. | |
| 115 // The exiting thread does _not_ grant or pass ownership to the | |
| 116 // successor thread. (This is also referred to as "handoff" succession"). | |
| 117 // Instead the exiting thread releases ownership and possibly wakes | |
| 118 // a successor, so the successor can (re)compete for ownership of the lock. | |
| 119 // | |
| 120 // Competitive handoff provides excellent overall throughput at the expense | |
| 121 // of short-term fairness. If fairness is a concern then one remedy might | |
| 122 // be to add an AcquireCounter field to the monitor. After a thread acquires | |
| 123 // the lock it will decrement the AcquireCounter field. When the count | |
| 124 // reaches 0 the thread would reset the AcquireCounter variable, abdicate | |
| 125 // the lock directly to some thread on the EntryList, and then move itself to the | |
| 126 // tail of the EntryList. | |
| 127 // | |
| 128 // But in practice most threads engage or otherwise participate in resource | |
| 129 // bounded producer-consumer relationships, so lock domination is not usually | |
| 130 // a practical concern. Recall too, that in general it's easier to construct | |
| 131 // a fair lock from a fast lock, but not vice-versa. | |
| 132 // | |
| 133 // * The cxq can have multiple concurrent "pushers" but only one concurrent | |
| 134 // detaching thread. This mechanism is immune from the ABA corruption. | |
| 135 // More precisely, the CAS-based "push" onto cxq is ABA-oblivious. | |
| 136 // We use OnDeck as a pseudo-lock to enforce the at-most-one detaching | |
| 137 // thread constraint. | |
| 138 // | |
| 139 // * Taken together, the cxq and the EntryList constitute or form a | |
| 140 // single logical queue of threads stalled trying to acquire the lock. | |
| 141 // We use two distinct lists to reduce heat on the list ends. | |
| 142 // Threads in lock() enqueue onto cxq while threads in unlock() will | |
| 143 // dequeue from the EntryList. (c.f. Michael Scott's "2Q" algorithm). | |
| 144 // A key desideratum is to minimize queue & monitor metadata manipulation | |
| 145 // that occurs while holding the "outer" monitor lock -- that is, we want to | |
| 146 // minimize monitor lock holds times. | |
| 147 // | |
| 148 // The EntryList is ordered by the prevailing queue discipline and | |
| 149 // can be organized in any convenient fashion, such as a doubly-linked list or | |
| 150 // a circular doubly-linked list. If we need a priority queue then something akin | |
| 151 // to Solaris' sleepq would work nicely. Viz., | |
| 152 // -- http://agg.eng/ws/on10_nightly/source/usr/src/uts/common/os/sleepq.c. | |
| 153 // -- http://cvs.opensolaris.org/source/xref/onnv/onnv-gate/usr/src/uts/common/os/sleepq.c | |
| 154 // Queue discipline is enforced at ::unlock() time, when the unlocking thread | |
| 155 // drains the cxq into the EntryList, and orders or reorders the threads on the | |
| 156 // EntryList accordingly. | |
| 157 // | |
| 158 // Barring "lock barging", this mechanism provides fair cyclic ordering, | |
| 159 // somewhat similar to an elevator-scan. | |
| 160 // | |
| 161 // * OnDeck | |
| 162 // -- For a given monitor there can be at most one OnDeck thread at any given | |
| 163 // instant. The OnDeck thread is contending for the lock, but has been | |
| 164 // unlinked from the EntryList and cxq by some previous unlock() operations. | |
| 165 // Once a thread has been designated the OnDeck thread it will remain so | |
| 166 // until it manages to acquire the lock -- being OnDeck is a stable property. | |
| 167 // -- Threads on the EntryList or cxq are _not allowed to attempt lock acquisition. | |
| 168 // -- OnDeck also serves as an "inner lock" as follows. Threads in unlock() will, after | |
| 169 // having cleared the LockByte and dropped the outer lock, attempt to "trylock" | |
| 170 // OnDeck by CASing the field from null to non-null. If successful, that thread | |
| 171 // is then responsible for progress and succession and can use CAS to detach and | |
| 172 // drain the cxq into the EntryList. By convention, only this thread, the holder of | |
| 173 // the OnDeck inner lock, can manipulate the EntryList or detach and drain the | |
| 174 // RATs on the cxq into the EntryList. This avoids ABA corruption on the cxq as | |
| 175 // we allow multiple concurrent "push" operations but restrict detach concurrency | |
| 176 // to at most one thread. Having selected and detached a successor, the thread then | |
| 177 // changes the OnDeck to refer to that successor, and then unparks the successor. | |
| 178 // That successor will eventually acquire the lock and clear OnDeck. Beware | |
| 179 // that the OnDeck usage as a lock is asymmetric. A thread in unlock() transiently | |
| 180 // "acquires" OnDeck, performs queue manipulations, passes OnDeck to some successor, | |
| 181 // and then the successor eventually "drops" OnDeck. Note that there's never | |
| 182 // any sense of contention on the inner lock, however. Threads never contend | |
| 183 // or wait for the inner lock. | |
| 184 // -- OnDeck provides for futile wakeup throttling a described in section 3.3 of | |
| 185 // See http://www.usenix.org/events/jvm01/full_papers/dice/dice.pdf | |
| 186 // In a sense, OnDeck subsumes the ObjectMonitor _Succ and ObjectWaiter | |
| 187 // TState fields found in Java-level objectMonitors. (See synchronizer.cpp). | |
| 188 // | |
| 189 // * Waiting threads reside on the WaitSet list -- wait() puts | |
| 190 // the caller onto the WaitSet. Notify() or notifyAll() simply | |
| 191 // transfers threads from the WaitSet to either the EntryList or cxq. | |
| 192 // Subsequent unlock() operations will eventually unpark the notifyee. | |
| 193 // Unparking a notifee in notify() proper is inefficient - if we were to do so | |
| 194 // it's likely the notifyee would simply impale itself on the lock held | |
| 195 // by the notifier. | |
| 196 // | |
| 197 // * The mechanism is obstruction-free in that if the holder of the transient | |
| 198 // OnDeck lock in unlock() is preempted or otherwise stalls, other threads | |
| 199 // can still acquire and release the outer lock and continue to make progress. | |
| 200 // At worst, waking of already blocked contending threads may be delayed, | |
| 201 // but nothing worse. (We only use "trylock" operations on the inner OnDeck | |
| 202 // lock). | |
| 203 // | |
| 204 // * Note that thread-local storage must be initialized before a thread | |
| 205 // uses Native monitors or mutexes. The native monitor-mutex subsystem | |
| 206 // depends on Thread::current(). | |
| 207 // | |
| 208 // * The monitor synchronization subsystem avoids the use of native | |
| 209 // synchronization primitives except for the narrow platform-specific | |
| 210 // park-unpark abstraction. See the comments in os_solaris.cpp regarding | |
| 211 // the semantics of park-unpark. Put another way, this monitor implementation | |
| 212 // depends only on atomic operations and park-unpark. The monitor subsystem | |
| 213 // manages all RUNNING->BLOCKED and BLOCKED->READY transitions while the | |
| 214 // underlying OS manages the READY<->RUN transitions. | |
| 215 // | |
| 216 // * The memory consistency model provide by lock()-unlock() is at least as | |
| 217 // strong or stronger than the Java Memory model defined by JSR-133. | |
| 218 // That is, we guarantee at least entry consistency, if not stronger. | |
| 219 // See http://g.oswego.edu/dl/jmm/cookbook.html. | |
| 220 // | |
| 221 // * Thread:: currently contains a set of purpose-specific ParkEvents: | |
| 222 // _MutexEvent, _ParkEvent, etc. A better approach might be to do away with | |
| 223 // the purpose-specific ParkEvents and instead implement a general per-thread | |
| 224 // stack of available ParkEvents which we could provision on-demand. The | |
| 225 // stack acts as a local cache to avoid excessive calls to ParkEvent::Allocate() | |
| 226 // and ::Release(). A thread would simply pop an element from the local stack before it | |
| 227 // enqueued or park()ed. When the contention was over the thread would | |
| 228 // push the no-longer-needed ParkEvent back onto its stack. | |
| 229 // | |
| 230 // * A slightly reduced form of ILock() and IUnlock() have been partially | |
| 231 // model-checked (Murphi) for safety and progress at T=1,2,3 and 4. | |
| 232 // It'd be interesting to see if TLA/TLC could be useful as well. | |
| 233 // | |
| 234 // * Mutex-Monitor is a low-level "leaf" subsystem. That is, the monitor | |
| 235 // code should never call other code in the JVM that might itself need to | |
| 236 // acquire monitors or mutexes. That's true *except* in the case of the | |
| 237 // ThreadBlockInVM state transition wrappers. The ThreadBlockInVM DTOR handles | |
| 238 // mutator reentry (ingress) by checking for a pending safepoint in which case it will | |
| 239 // call SafepointSynchronize::block(), which in turn may call Safepoint_lock->lock(), etc. | |
| 240 // In that particular case a call to lock() for a given Monitor can end up recursively | |
| 241 // calling lock() on another monitor. While distasteful, this is largely benign | |
| 242 // as the calls come from jacket that wraps lock(), and not from deep within lock() itself. | |
| 243 // | |
| 244 // It's unfortunate that native mutexes and thread state transitions were convolved. | |
| 245 // They're really separate concerns and should have remained that way. Melding | |
| 246 // them together was facile -- a bit too facile. The current implementation badly | |
| 247 // conflates the two concerns. | |
| 248 // | |
| 249 // * TODO-FIXME: | |
| 250 // | |
| 251 // -- Add DTRACE probes for contended acquire, contended acquired, contended unlock | |
| 252 // We should also add DTRACE probes in the ParkEvent subsystem for | |
| 253 // Park-entry, Park-exit, and Unpark. | |
| 254 // | |
| 255 // -- We have an excess of mutex-like constructs in the JVM, namely: | |
| 256 // 1. objectMonitors for Java-level synchronization (synchronizer.cpp) | |
| 257 // 2. low-level muxAcquire and muxRelease | |
| 258 // 3. low-level spinAcquire and spinRelease | |
| 259 // 4. native Mutex:: and Monitor:: | |
| 260 // 5. jvm_raw_lock() and _unlock() | |
| 261 // 6. JVMTI raw monitors -- distinct from (5) despite having a confusingly | |
| 262 // similar name. | |
| 263 // | |
| 264 // o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o-o | |
| 265 | |
| 266 | |
| 267 // CASPTR() uses the canonical argument order that dominates in the literature. | |
| 268 // Our internal cmpxchg_ptr() uses a bastardized ordering to accommodate Sun .il templates. | |
| 269 | |
| 270 #define CASPTR(a,c,s) intptr_t(Atomic::cmpxchg_ptr ((void *)(s),(void *)(a),(void *)(c))) | |
| 271 #define UNS(x) (uintptr_t(x)) | |
| 272 #define TRACE(m) { static volatile int ctr = 0 ; int x = ++ctr ; if ((x & (x-1))==0) { ::printf ("%d:%s\n", x, #m); ::fflush(stdout); }} | |
| 273 | |
| 274 // Simplistic low-quality Marsaglia SHIFT-XOR RNG. | |
| 275 // Bijective except for the trailing mask operation. | |
| 276 // Useful for spin loops as the compiler can't optimize it away. | |
| 277 | |
| 278 static inline jint MarsagliaXORV (jint x) { | |
| 279 if (x == 0) x = 1|os::random() ; | |
| 280 x ^= x << 6; | |
| 281 x ^= ((unsigned)x) >> 21; | |
| 282 x ^= x << 7 ; | |
| 283 return x & 0x7FFFFFFF ; | |
| 284 } | |
| 285 | |
| 286 static inline jint MarsagliaXOR (jint * const a) { | |
| 287 jint x = *a ; | |
| 288 if (x == 0) x = UNS(a)|1 ; | |
| 289 x ^= x << 6; | |
| 290 x ^= ((unsigned)x) >> 21; | |
| 291 x ^= x << 7 ; | |
| 292 *a = x ; | |
| 293 return x & 0x7FFFFFFF ; | |
| 294 } | |
| 295 | |
| 296 static int Stall (int its) { | |
| 297 static volatile jint rv = 1 ; | |
| 298 volatile int OnFrame = 0 ; | |
| 299 jint v = rv ^ UNS(OnFrame) ; | |
| 300 while (--its >= 0) { | |
| 301 v = MarsagliaXORV (v) ; | |
| 302 } | |
| 303 // Make this impossible for the compiler to optimize away, | |
| 304 // but (mostly) avoid W coherency sharing on MP systems. | |
| 305 if (v == 0x12345) rv = v ; | |
| 306 return v ; | |
| 307 } | |
| 308 | |
| 309 int Monitor::TryLock () { | |
| 310 intptr_t v = _LockWord.FullWord ; | |
| 311 for (;;) { | |
| 312 if ((v & _LBIT) != 0) return 0 ; | |
| 313 const intptr_t u = CASPTR (&_LockWord, v, v|_LBIT) ; | |
| 314 if (v == u) return 1 ; | |
| 315 v = u ; | |
| 316 } | |
| 317 } | |
| 318 | |
| 319 int Monitor::TryFast () { | |
| 320 // Optimistic fast-path form ... | |
| 321 // Fast-path attempt for the common uncontended case. | |
| 322 // Avoid RTS->RTO $ coherence upgrade on typical SMP systems. | |
| 323 intptr_t v = CASPTR (&_LockWord, 0, _LBIT) ; // agro ... | |
| 324 if (v == 0) return 1 ; | |
| 325 | |
| 326 for (;;) { | |
| 327 if ((v & _LBIT) != 0) return 0 ; | |
| 328 const intptr_t u = CASPTR (&_LockWord, v, v|_LBIT) ; | |
| 329 if (v == u) return 1 ; | |
| 330 v = u ; | |
| 331 } | |
| 332 } | |
| 333 | |
| 334 int Monitor::ILocked () { | |
| 335 const intptr_t w = _LockWord.FullWord & 0xFF ; | |
| 336 assert (w == 0 || w == _LBIT, "invariant") ; | |
| 337 return w == _LBIT ; | |
| 338 } | |
| 339 | |
| 340 // Polite TATAS spinlock with exponential backoff - bounded spin. | |
| 341 // Ideally we'd use processor cycles, time or vtime to control | |
| 342 // the loop, but we currently use iterations. | |
| 343 // All the constants within were derived empirically but work over | |
| 344 // over the spectrum of J2SE reference platforms. | |
| 345 // On Niagara-class systems the back-off is unnecessary but | |
| 346 // is relatively harmless. (At worst it'll slightly retard | |
| 347 // acquisition times). The back-off is critical for older SMP systems | |
| 348 // where constant fetching of the LockWord would otherwise impair | |
| 349 // scalability. | |
| 350 // | |
| 351 // Clamp spinning at approximately 1/2 of a context-switch round-trip. | |
| 352 // See synchronizer.cpp for details and rationale. | |
| 353 | |
| 354 int Monitor::TrySpin (Thread * const Self) { | |
| 355 if (TryLock()) return 1 ; | |
| 356 if (!os::is_MP()) return 0 ; | |
| 357 | |
| 358 int Probes = 0 ; | |
| 359 int Delay = 0 ; | |
| 360 int Steps = 0 ; | |
| 361 int SpinMax = NativeMonitorSpinLimit ; | |
| 362 int flgs = NativeMonitorFlags ; | |
| 363 for (;;) { | |
| 364 intptr_t v = _LockWord.FullWord; | |
| 365 if ((v & _LBIT) == 0) { | |
| 366 if (CASPTR (&_LockWord, v, v|_LBIT) == v) { | |
| 367 return 1 ; | |
| 368 } | |
| 369 continue ; | |
| 370 } | |
| 371 | |
| 372 if ((flgs & 8) == 0) { | |
| 373 SpinPause () ; | |
| 374 } | |
| 375 | |
| 376 // Periodically increase Delay -- variable Delay form | |
| 377 // conceptually: delay *= 1 + 1/Exponent | |
| 378 ++ Probes; | |
| 379 if (Probes > SpinMax) return 0 ; | |
| 380 | |
| 381 if ((Probes & 0x7) == 0) { | |
| 382 Delay = ((Delay << 1)|1) & 0x7FF ; | |
| 383 // CONSIDER: Delay += 1 + (Delay/4); Delay &= 0x7FF ; | |
| 384 } | |
| 385 | |
| 386 if (flgs & 2) continue ; | |
| 387 | |
| 388 // Consider checking _owner's schedctl state, if OFFPROC abort spin. | |
| 389 // If the owner is OFFPROC then it's unlike that the lock will be dropped | |
| 390 // in a timely fashion, which suggests that spinning would not be fruitful | |
| 391 // or profitable. | |
| 392 | |
| 393 // Stall for "Delay" time units - iterations in the current implementation. | |
| 394 // Avoid generating coherency traffic while stalled. | |
| 395 // Possible ways to delay: | |
| 396 // PAUSE, SLEEP, MEMBAR #sync, MEMBAR #halt, | |
| 397 // wr %g0,%asi, gethrtime, rdstick, rdtick, rdtsc, etc. ... | |
| 398 // Note that on Niagara-class systems we want to minimize STs in the | |
| 399 // spin loop. N1 and brethren write-around the L1$ over the xbar into the L2$. | |
| 400 // Furthermore, they don't have a W$ like traditional SPARC processors. | |
| 401 // We currently use a Marsaglia Shift-Xor RNG loop. | |
| 402 Steps += Delay ; | |
| 403 if (Self != NULL) { | |
| 404 jint rv = Self->rng[0] ; | |
| 405 for (int k = Delay ; --k >= 0; ) { | |
| 406 rv = MarsagliaXORV (rv) ; | |
| 407 if ((flgs & 4) == 0 && SafepointSynchronize::do_call_back()) return 0 ; | |
| 408 } | |
| 409 Self->rng[0] = rv ; | |
| 410 } else { | |
| 411 Stall (Delay) ; | |
| 412 } | |
| 413 } | |
| 414 } | |
| 415 | |
| 416 static int ParkCommon (ParkEvent * ev, jlong timo) { | |
| 417 // Diagnostic support - periodically unwedge blocked threads | |
| 418 intx nmt = NativeMonitorTimeout ; | |
| 419 if (nmt > 0 && (nmt < timo || timo <= 0)) { | |
| 420 timo = nmt ; | |
| 421 } | |
| 422 int err = OS_OK ; | |
| 423 if (0 == timo) { | |
| 424 ev->park() ; | |
| 425 } else { | |
| 426 err = ev->park(timo) ; | |
| 427 } | |
| 428 return err ; | |
| 429 } | |
| 430 | |
| 431 inline int Monitor::AcquireOrPush (ParkEvent * ESelf) { | |
| 432 intptr_t v = _LockWord.FullWord ; | |
| 433 for (;;) { | |
| 434 if ((v & _LBIT) == 0) { | |
| 435 const intptr_t u = CASPTR (&_LockWord, v, v|_LBIT) ; | |
| 436 if (u == v) return 1 ; // indicate acquired | |
| 437 v = u ; | |
| 438 } else { | |
| 439 // Anticipate success ... | |
| 440 ESelf->ListNext = (ParkEvent *) (v & ~_LBIT) ; | |
| 441 const intptr_t u = CASPTR (&_LockWord, v, intptr_t(ESelf)|_LBIT) ; | |
| 442 if (u == v) return 0 ; // indicate pushed onto cxq | |
| 443 v = u ; | |
| 444 } | |
| 445 // Interference - LockWord change - just retry | |
| 446 } | |
| 447 } | |
| 448 | |
| 449 // ILock and IWait are the lowest level primitive internal blocking | |
| 450 // synchronization functions. The callers of IWait and ILock must have | |
| 451 // performed any needed state transitions beforehand. | |
| 452 // IWait and ILock may directly call park() without any concern for thread state. | |
| 453 // Note that ILock and IWait do *not* access _owner. | |
| 454 // _owner is a higher-level logical concept. | |
| 455 | |
| 456 void Monitor::ILock (Thread * Self) { | |
| 457 assert (_OnDeck != Self->_MutexEvent, "invariant") ; | |
| 458 | |
| 459 if (TryFast()) { | |
| 460 Exeunt: | |
| 461 assert (ILocked(), "invariant") ; | |
| 462 return ; | |
| 463 } | |
| 464 | |
| 465 ParkEvent * const ESelf = Self->_MutexEvent ; | |
| 466 assert (_OnDeck != ESelf, "invariant") ; | |
| 467 | |
| 468 // As an optimization, spinners could conditionally try to set ONDECK to _LBIT | |
| 469 // Synchronizer.cpp uses a similar optimization. | |
| 470 if (TrySpin (Self)) goto Exeunt ; | |
| 471 | |
| 472 // Slow-path - the lock is contended. | |
| 473 // Either Enqueue Self on cxq or acquire the outer lock. | |
| 474 // LockWord encoding = (cxq,LOCKBYTE) | |
| 475 ESelf->reset() ; | |
| 476 OrderAccess::fence() ; | |
| 477 | |
| 478 // Optional optimization ... try barging on the inner lock | |
| 479 if ((NativeMonitorFlags & 32) && CASPTR (&_OnDeck, NULL, UNS(Self)) == 0) { | |
| 480 goto OnDeck_LOOP ; | |
| 481 } | |
| 482 | |
| 483 if (AcquireOrPush (ESelf)) goto Exeunt ; | |
| 484 | |
| 485 // At any given time there is at most one ondeck thread. | |
| 486 // ondeck implies not resident on cxq and not resident on EntryList | |
| 487 // Only the OnDeck thread can try to acquire -- contended for -- the lock. | |
| 488 // CONSIDER: use Self->OnDeck instead of m->OnDeck. | |
| 489 // Deschedule Self so that others may run. | |
| 490 while (_OnDeck != ESelf) { | |
| 491 ParkCommon (ESelf, 0) ; | |
| 492 } | |
| 493 | |
| 494 // Self is now in the ONDECK position and will remain so until it | |
| 495 // manages to acquire the lock. | |
| 496 OnDeck_LOOP: | |
| 497 for (;;) { | |
| 498 assert (_OnDeck == ESelf, "invariant") ; | |
| 499 if (TrySpin (Self)) break ; | |
| 500 // CONSIDER: if ESelf->TryPark() && TryLock() break ... | |
| 501 // It's probably wise to spin only if we *actually* blocked | |
| 502 // CONSIDER: check the lockbyte, if it remains set then | |
| 503 // preemptively drain the cxq into the EntryList. | |
| 504 // The best place and time to perform queue operations -- lock metadata -- | |
| 505 // is _before having acquired the outer lock, while waiting for the lock to drop. | |
| 506 ParkCommon (ESelf, 0) ; | |
| 507 } | |
| 508 | |
| 509 assert (_OnDeck == ESelf, "invariant") ; | |
| 510 _OnDeck = NULL ; | |
| 511 | |
| 512 // Note that we current drop the inner lock (clear OnDeck) in the slow-path | |
| 513 // epilog immediately after having acquired the outer lock. | |
| 514 // But instead we could consider the following optimizations: | |
| 515 // A. Shift or defer dropping the inner lock until the subsequent IUnlock() operation. | |
| 516 // This might avoid potential reacquisition of the inner lock in IUlock(). | |
| 517 // B. While still holding the inner lock, attempt to opportunistically select | |
| 518 // and unlink the next ONDECK thread from the EntryList. | |
| 519 // If successful, set ONDECK to refer to that thread, otherwise clear ONDECK. | |
| 520 // It's critical that the select-and-unlink operation run in constant-time as | |
| 521 // it executes when holding the outer lock and may artificially increase the | |
| 522 // effective length of the critical section. | |
| 523 // Note that (A) and (B) are tantamount to succession by direct handoff for | |
| 524 // the inner lock. | |
| 525 goto Exeunt ; | |
| 526 } | |
| 527 | |
| 528 void Monitor::IUnlock (bool RelaxAssert) { | |
| 529 assert (ILocked(), "invariant") ; | |
|
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530 // Conceptually we need a MEMBAR #storestore|#loadstore barrier or fence immediately |
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531 // before the store that releases the lock. Crucially, all the stores and loads in the |
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532 // critical section must be globally visible before the store of 0 into the lock-word |
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533 // that releases the lock becomes globally visible. That is, memory accesses in the |
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534 // critical section should not be allowed to bypass or overtake the following ST that |
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535 // releases the lock. As such, to prevent accesses within the critical section |
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536 // from "leaking" out, we need a release fence between the critical section and the |
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537 // store that releases the lock. In practice that release barrier is elided on |
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538 // platforms with strong memory models such as TSO. |
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539 // |
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540 // Note that the OrderAccess::storeload() fence that appears after unlock store |
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541 // provides for progress conditions and succession and is _not related to exclusion |
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542 // safety or lock release consistency. |
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543 OrderAccess::release_store(&_LockWord.Bytes[_LSBINDEX], 0); // drop outer lock |
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544 |
| 0 | 545 OrderAccess::storeload (); |
| 546 ParkEvent * const w = _OnDeck ; | |
| 547 assert (RelaxAssert || w != Thread::current()->_MutexEvent, "invariant") ; | |
| 548 if (w != NULL) { | |
| 549 // Either we have a valid ondeck thread or ondeck is transiently "locked" | |
| 550 // by some exiting thread as it arranges for succession. The LSBit of | |
| 551 // OnDeck allows us to discriminate two cases. If the latter, the | |
| 552 // responsibility for progress and succession lies with that other thread. | |
| 553 // For good performance, we also depend on the fact that redundant unpark() | |
| 554 // operations are cheap. That is, repeated Unpark()ing of the ONDECK thread | |
| 555 // is inexpensive. This approach provides implicit futile wakeup throttling. | |
| 556 // Note that the referent "w" might be stale with respect to the lock. | |
| 557 // In that case the following unpark() is harmless and the worst that'll happen | |
| 558 // is a spurious return from a park() operation. Critically, if "w" _is stale, | |
| 559 // then progress is known to have occurred as that means the thread associated | |
| 560 // with "w" acquired the lock. In that case this thread need take no further | |
| 561 // action to guarantee progress. | |
| 562 if ((UNS(w) & _LBIT) == 0) w->unpark() ; | |
| 563 return ; | |
| 564 } | |
| 565 | |
| 566 intptr_t cxq = _LockWord.FullWord ; | |
| 567 if (((cxq & ~_LBIT)|UNS(_EntryList)) == 0) { | |
| 568 return ; // normal fast-path exit - cxq and EntryList both empty | |
| 569 } | |
| 570 if (cxq & _LBIT) { | |
| 571 // Optional optimization ... | |
| 572 // Some other thread acquired the lock in the window since this | |
| 573 // thread released it. Succession is now that thread's responsibility. | |
| 574 return ; | |
| 575 } | |
| 576 | |
| 577 Succession: | |
| 578 // Slow-path exit - this thread must ensure succession and progress. | |
| 579 // OnDeck serves as lock to protect cxq and EntryList. | |
| 580 // Only the holder of OnDeck can manipulate EntryList or detach the RATs from cxq. | |
| 581 // Avoid ABA - allow multiple concurrent producers (enqueue via push-CAS) | |
| 582 // but only one concurrent consumer (detacher of RATs). | |
| 583 // Consider protecting this critical section with schedctl on Solaris. | |
| 584 // Unlike a normal lock, however, the exiting thread "locks" OnDeck, | |
| 585 // picks a successor and marks that thread as OnDeck. That successor | |
| 586 // thread will then clear OnDeck once it eventually acquires the outer lock. | |
| 587 if (CASPTR (&_OnDeck, NULL, _LBIT) != UNS(NULL)) { | |
| 588 return ; | |
| 589 } | |
| 590 | |
| 591 ParkEvent * List = _EntryList ; | |
| 592 if (List != NULL) { | |
| 593 // Transfer the head of the EntryList to the OnDeck position. | |
| 594 // Once OnDeck, a thread stays OnDeck until it acquires the lock. | |
| 595 // For a given lock there is at most OnDeck thread at any one instant. | |
| 596 WakeOne: | |
| 597 assert (List == _EntryList, "invariant") ; | |
| 598 ParkEvent * const w = List ; | |
| 599 assert (RelaxAssert || w != Thread::current()->_MutexEvent, "invariant") ; | |
| 600 _EntryList = w->ListNext ; | |
| 601 // as a diagnostic measure consider setting w->_ListNext = BAD | |
| 602 assert (UNS(_OnDeck) == _LBIT, "invariant") ; | |
| 603 _OnDeck = w ; // pass OnDeck to w. | |
| 604 // w will clear OnDeck once it acquires the outer lock | |
| 605 | |
| 606 // Another optional optimization ... | |
| 607 // For heavily contended locks it's not uncommon that some other | |
| 608 // thread acquired the lock while this thread was arranging succession. | |
| 609 // Try to defer the unpark() operation - Delegate the responsibility | |
| 610 // for unpark()ing the OnDeck thread to the current or subsequent owners | |
| 611 // That is, the new owner is responsible for unparking the OnDeck thread. | |
| 612 OrderAccess::storeload() ; | |
| 613 cxq = _LockWord.FullWord ; | |
| 614 if (cxq & _LBIT) return ; | |
| 615 | |
| 616 w->unpark() ; | |
| 617 return ; | |
| 618 } | |
| 619 | |
| 620 cxq = _LockWord.FullWord ; | |
| 621 if ((cxq & ~_LBIT) != 0) { | |
| 622 // The EntryList is empty but the cxq is populated. | |
| 623 // drain RATs from cxq into EntryList | |
| 624 // Detach RATs segment with CAS and then merge into EntryList | |
| 625 for (;;) { | |
| 626 // optional optimization - if locked, the owner is responsible for succession | |
| 627 if (cxq & _LBIT) goto Punt ; | |
| 628 const intptr_t vfy = CASPTR (&_LockWord, cxq, cxq & _LBIT) ; | |
| 629 if (vfy == cxq) break ; | |
| 630 cxq = vfy ; | |
| 631 // Interference - LockWord changed - Just retry | |
| 632 // We can see concurrent interference from contending threads | |
| 633 // pushing themselves onto the cxq or from lock-unlock operations. | |
| 634 // From the perspective of this thread, EntryList is stable and | |
| 635 // the cxq is prepend-only -- the head is volatile but the interior | |
| 636 // of the cxq is stable. In theory if we encounter interference from threads | |
| 637 // pushing onto cxq we could simply break off the original cxq suffix and | |
| 638 // move that segment to the EntryList, avoiding a 2nd or multiple CAS attempts | |
| 639 // on the high-traffic LockWord variable. For instance lets say the cxq is "ABCD" | |
| 640 // when we first fetch cxq above. Between the fetch -- where we observed "A" | |
| 641 // -- and CAS -- where we attempt to CAS null over A -- "PQR" arrive, | |
| 642 // yielding cxq = "PQRABCD". In this case we could simply set A.ListNext | |
| 643 // null, leaving cxq = "PQRA" and transfer the "BCD" segment to the EntryList. | |
| 644 // Note too, that it's safe for this thread to traverse the cxq | |
| 645 // without taking any special concurrency precautions. | |
| 646 } | |
| 647 | |
| 648 // We don't currently reorder the cxq segment as we move it onto | |
| 649 // the EntryList, but it might make sense to reverse the order | |
| 650 // or perhaps sort by thread priority. See the comments in | |
| 651 // synchronizer.cpp objectMonitor::exit(). | |
| 652 assert (_EntryList == NULL, "invariant") ; | |
| 653 _EntryList = List = (ParkEvent *)(cxq & ~_LBIT) ; | |
| 654 assert (List != NULL, "invariant") ; | |
| 655 goto WakeOne ; | |
| 656 } | |
| 657 | |
| 658 // cxq|EntryList is empty. | |
| 659 // w == NULL implies that cxq|EntryList == NULL in the past. | |
| 660 // Possible race - rare inopportune interleaving. | |
| 661 // A thread could have added itself to cxq since this thread previously checked. | |
| 662 // Detect and recover by refetching cxq. | |
| 663 Punt: | |
| 664 assert (UNS(_OnDeck) == _LBIT, "invariant") ; | |
| 665 _OnDeck = NULL ; // Release inner lock. | |
| 666 OrderAccess::storeload(); // Dekker duality - pivot point | |
| 667 | |
| 668 // Resample LockWord/cxq to recover from possible race. | |
| 669 // For instance, while this thread T1 held OnDeck, some other thread T2 might | |
| 670 // acquire the outer lock. Another thread T3 might try to acquire the outer | |
| 671 // lock, but encounter contention and enqueue itself on cxq. T2 then drops the | |
| 672 // outer lock, but skips succession as this thread T1 still holds OnDeck. | |
| 673 // T1 is and remains responsible for ensuring succession of T3. | |
| 674 // | |
| 675 // Note that we don't need to recheck EntryList, just cxq. | |
| 676 // If threads moved onto EntryList since we dropped OnDeck | |
| 677 // that implies some other thread forced succession. | |
| 678 cxq = _LockWord.FullWord ; | |
| 679 if ((cxq & ~_LBIT) != 0 && (cxq & _LBIT) == 0) { | |
| 680 goto Succession ; // potential race -- re-run succession | |
| 681 } | |
| 682 return ; | |
| 683 } | |
| 684 | |
| 685 bool Monitor::notify() { | |
| 686 assert (_owner == Thread::current(), "invariant") ; | |
| 687 assert (ILocked(), "invariant") ; | |
| 688 if (_WaitSet == NULL) return true ; | |
| 689 NotifyCount ++ ; | |
| 690 | |
| 691 // Transfer one thread from the WaitSet to the EntryList or cxq. | |
| 692 // Currently we just unlink the head of the WaitSet and prepend to the cxq. | |
| 693 // And of course we could just unlink it and unpark it, too, but | |
| 694 // in that case it'd likely impale itself on the reentry. | |
| 695 Thread::muxAcquire (_WaitLock, "notify:WaitLock") ; | |
| 696 ParkEvent * nfy = _WaitSet ; | |
| 697 if (nfy != NULL) { // DCL idiom | |
| 698 _WaitSet = nfy->ListNext ; | |
| 699 assert (nfy->Notified == 0, "invariant") ; | |
| 700 // push nfy onto the cxq | |
| 701 for (;;) { | |
| 702 const intptr_t v = _LockWord.FullWord ; | |
| 703 assert ((v & 0xFF) == _LBIT, "invariant") ; | |
| 704 nfy->ListNext = (ParkEvent *)(v & ~_LBIT); | |
| 705 if (CASPTR (&_LockWord, v, UNS(nfy)|_LBIT) == v) break; | |
| 706 // interference - _LockWord changed -- just retry | |
| 707 } | |
| 708 // Note that setting Notified before pushing nfy onto the cxq is | |
| 709 // also legal and safe, but the safety properties are much more | |
| 710 // subtle, so for the sake of code stewardship ... | |
| 711 OrderAccess::fence() ; | |
| 712 nfy->Notified = 1; | |
| 713 } | |
| 714 Thread::muxRelease (_WaitLock) ; | |
| 715 if (nfy != NULL && (NativeMonitorFlags & 16)) { | |
| 716 // Experimental code ... light up the wakee in the hope that this thread (the owner) | |
| 717 // will drop the lock just about the time the wakee comes ONPROC. | |
| 718 nfy->unpark() ; | |
| 719 } | |
| 720 assert (ILocked(), "invariant") ; | |
| 721 return true ; | |
| 722 } | |
| 723 | |
| 724 // Currently notifyAll() transfers the waiters one-at-a-time from the waitset | |
| 725 // to the cxq. This could be done more efficiently with a single bulk en-mass transfer, | |
| 726 // but in practice notifyAll() for large #s of threads is rare and not time-critical. | |
| 727 // Beware too, that we invert the order of the waiters. Lets say that the | |
| 728 // waitset is "ABCD" and the cxq is "XYZ". After a notifyAll() the waitset | |
| 729 // will be empty and the cxq will be "DCBAXYZ". This is benign, of course. | |
| 730 | |
| 731 bool Monitor::notify_all() { | |
| 732 assert (_owner == Thread::current(), "invariant") ; | |
| 733 assert (ILocked(), "invariant") ; | |
| 734 while (_WaitSet != NULL) notify() ; | |
| 735 return true ; | |
| 736 } | |
| 737 | |
| 738 int Monitor::IWait (Thread * Self, jlong timo) { | |
| 739 assert (ILocked(), "invariant") ; | |
| 740 | |
| 741 // Phases: | |
| 742 // 1. Enqueue Self on WaitSet - currently prepend | |
| 743 // 2. unlock - drop the outer lock | |
| 744 // 3. wait for either notification or timeout | |
| 745 // 4. lock - reentry - reacquire the outer lock | |
| 746 | |
| 747 ParkEvent * const ESelf = Self->_MutexEvent ; | |
| 748 ESelf->Notified = 0 ; | |
| 749 ESelf->reset() ; | |
| 750 OrderAccess::fence() ; | |
| 751 | |
| 752 // Add Self to WaitSet | |
| 753 // Ideally only the holder of the outer lock would manipulate the WaitSet - | |
| 754 // That is, the outer lock would implicitly protect the WaitSet. | |
| 755 // But if a thread in wait() encounters a timeout it will need to dequeue itself | |
| 756 // from the WaitSet _before it becomes the owner of the lock. We need to dequeue | |
| 757 // as the ParkEvent -- which serves as a proxy for the thread -- can't reside | |
| 758 // on both the WaitSet and the EntryList|cxq at the same time.. That is, a thread | |
| 759 // on the WaitSet can't be allowed to compete for the lock until it has managed to | |
| 760 // unlink its ParkEvent from WaitSet. Thus the need for WaitLock. | |
| 761 // Contention on the WaitLock is minimal. | |
| 762 // | |
| 763 // Another viable approach would be add another ParkEvent, "WaitEvent" to the | |
| 764 // thread class. The WaitSet would be composed of WaitEvents. Only the | |
| 765 // owner of the outer lock would manipulate the WaitSet. A thread in wait() | |
| 766 // could then compete for the outer lock, and then, if necessary, unlink itself | |
| 767 // from the WaitSet only after having acquired the outer lock. More precisely, | |
| 768 // there would be no WaitLock. A thread in in wait() would enqueue its WaitEvent | |
| 769 // on the WaitSet; release the outer lock; wait for either notification or timeout; | |
| 770 // reacquire the inner lock; and then, if needed, unlink itself from the WaitSet. | |
| 771 // | |
| 772 // Alternatively, a 2nd set of list link fields in the ParkEvent might suffice. | |
| 773 // One set would be for the WaitSet and one for the EntryList. | |
| 774 // We could also deconstruct the ParkEvent into a "pure" event and add a | |
| 775 // new immortal/TSM "ListElement" class that referred to ParkEvents. | |
| 776 // In that case we could have one ListElement on the WaitSet and another | |
| 777 // on the EntryList, with both referring to the same pure Event. | |
| 778 | |
| 779 Thread::muxAcquire (_WaitLock, "wait:WaitLock:Add") ; | |
| 780 ESelf->ListNext = _WaitSet ; | |
| 781 _WaitSet = ESelf ; | |
| 782 Thread::muxRelease (_WaitLock) ; | |
| 783 | |
| 784 // Release the outer lock | |
| 785 // We call IUnlock (RelaxAssert=true) as a thread T1 might | |
| 786 // enqueue itself on the WaitSet, call IUnlock(), drop the lock, | |
| 787 // and then stall before it can attempt to wake a successor. | |
| 788 // Some other thread T2 acquires the lock, and calls notify(), moving | |
| 789 // T1 from the WaitSet to the cxq. T2 then drops the lock. T1 resumes, | |
| 790 // and then finds *itself* on the cxq. During the course of a normal | |
| 791 // IUnlock() call a thread should _never find itself on the EntryList | |
| 792 // or cxq, but in the case of wait() it's possible. | |
| 793 // See synchronizer.cpp objectMonitor::wait(). | |
| 794 IUnlock (true) ; | |
| 795 | |
| 796 // Wait for either notification or timeout | |
| 797 // Beware that in some circumstances we might propagate | |
| 798 // spurious wakeups back to the caller. | |
| 799 | |
| 800 for (;;) { | |
| 801 if (ESelf->Notified) break ; | |
| 802 int err = ParkCommon (ESelf, timo) ; | |
| 803 if (err == OS_TIMEOUT || (NativeMonitorFlags & 1)) break ; | |
| 804 } | |
| 805 | |
| 806 // Prepare for reentry - if necessary, remove ESelf from WaitSet | |
| 807 // ESelf can be: | |
| 808 // 1. Still on the WaitSet. This can happen if we exited the loop by timeout. | |
| 809 // 2. On the cxq or EntryList | |
| 810 // 3. Not resident on cxq, EntryList or WaitSet, but in the OnDeck position. | |
| 811 | |
| 812 OrderAccess::fence() ; | |
| 813 int WasOnWaitSet = 0 ; | |
| 814 if (ESelf->Notified == 0) { | |
| 815 Thread::muxAcquire (_WaitLock, "wait:WaitLock:remove") ; | |
| 816 if (ESelf->Notified == 0) { // DCL idiom | |
| 817 assert (_OnDeck != ESelf, "invariant") ; // can't be both OnDeck and on WaitSet | |
| 818 // ESelf is resident on the WaitSet -- unlink it. | |
| 819 // A doubly-linked list would be better here so we can unlink in constant-time. | |
| 820 // We have to unlink before we potentially recontend as ESelf might otherwise | |
| 821 // end up on the cxq|EntryList -- it can't be on two lists at once. | |
| 822 ParkEvent * p = _WaitSet ; | |
| 823 ParkEvent * q = NULL ; // classic q chases p | |
| 824 while (p != NULL && p != ESelf) { | |
| 825 q = p ; | |
| 826 p = p->ListNext ; | |
| 827 } | |
| 828 assert (p == ESelf, "invariant") ; | |
| 829 if (p == _WaitSet) { // found at head | |
| 830 assert (q == NULL, "invariant") ; | |
| 831 _WaitSet = p->ListNext ; | |
| 832 } else { // found in interior | |
| 833 assert (q->ListNext == p, "invariant") ; | |
| 834 q->ListNext = p->ListNext ; | |
| 835 } | |
| 836 WasOnWaitSet = 1 ; // We were *not* notified but instead encountered timeout | |
| 837 } | |
| 838 Thread::muxRelease (_WaitLock) ; | |
| 839 } | |
| 840 | |
| 841 // Reentry phase - reacquire the lock | |
| 842 if (WasOnWaitSet) { | |
| 843 // ESelf was previously on the WaitSet but we just unlinked it above | |
| 844 // because of a timeout. ESelf is not resident on any list and is not OnDeck | |
| 845 assert (_OnDeck != ESelf, "invariant") ; | |
| 846 ILock (Self) ; | |
| 847 } else { | |
| 848 // A prior notify() operation moved ESelf from the WaitSet to the cxq. | |
| 849 // ESelf is now on the cxq, EntryList or at the OnDeck position. | |
| 850 // The following fragment is extracted from Monitor::ILock() | |
| 851 for (;;) { | |
| 852 if (_OnDeck == ESelf && TrySpin(Self)) break ; | |
| 853 ParkCommon (ESelf, 0) ; | |
| 854 } | |
| 855 assert (_OnDeck == ESelf, "invariant") ; | |
| 856 _OnDeck = NULL ; | |
| 857 } | |
| 858 | |
| 859 assert (ILocked(), "invariant") ; | |
| 860 return WasOnWaitSet != 0 ; // return true IFF timeout | |
| 861 } | |
| 862 | |
| 863 | |
| 864 // ON THE VMTHREAD SNEAKING PAST HELD LOCKS: | |
| 865 // In particular, there are certain types of global lock that may be held | |
| 866 // by a Java thread while it is blocked at a safepoint but before it has | |
| 867 // written the _owner field. These locks may be sneakily acquired by the | |
| 868 // VM thread during a safepoint to avoid deadlocks. Alternatively, one should | |
| 869 // identify all such locks, and ensure that Java threads never block at | |
| 870 // safepoints while holding them (_no_safepoint_check_flag). While it | |
| 871 // seems as though this could increase the time to reach a safepoint | |
| 872 // (or at least increase the mean, if not the variance), the latter | |
| 873 // approach might make for a cleaner, more maintainable JVM design. | |
| 874 // | |
| 875 // Sneaking is vile and reprehensible and should be excised at the 1st | |
| 876 // opportunity. It's possible that the need for sneaking could be obviated | |
| 877 // as follows. Currently, a thread might (a) while TBIVM, call pthread_mutex_lock | |
| 878 // or ILock() thus acquiring the "physical" lock underlying Monitor/Mutex. | |
| 879 // (b) stall at the TBIVM exit point as a safepoint is in effect. Critically, | |
| 880 // it'll stall at the TBIVM reentry state transition after having acquired the | |
| 881 // underlying lock, but before having set _owner and having entered the actual | |
| 882 // critical section. The lock-sneaking facility leverages that fact and allowed the | |
| 883 // VM thread to logically acquire locks that had already be physically locked by mutators | |
| 884 // but where mutators were known blocked by the reentry thread state transition. | |
| 885 // | |
| 886 // If we were to modify the Monitor-Mutex so that TBIVM state transitions tightly | |
| 887 // wrapped calls to park(), then we could likely do away with sneaking. We'd | |
| 888 // decouple lock acquisition and parking. The critical invariant to eliminating | |
| 889 // sneaking is to ensure that we never "physically" acquire the lock while TBIVM. | |
| 890 // An easy way to accomplish this is to wrap the park calls in a narrow TBIVM jacket. | |
| 891 // One difficulty with this approach is that the TBIVM wrapper could recurse and | |
| 892 // call lock() deep from within a lock() call, while the MutexEvent was already enqueued. | |
| 893 // Using a stack (N=2 at minimum) of ParkEvents would take care of that problem. | |
| 894 // | |
| 895 // But of course the proper ultimate approach is to avoid schemes that require explicit | |
| 896 // sneaking or dependence on any any clever invariants or subtle implementation properties | |
| 897 // of Mutex-Monitor and instead directly address the underlying design flaw. | |
| 898 | |
| 899 void Monitor::lock (Thread * Self) { | |
| 900 #ifdef CHECK_UNHANDLED_OOPS | |
| 901 // Clear unhandled oops so we get a crash right away. Only clear for non-vm | |
| 902 // or GC threads. | |
| 903 if (Self->is_Java_thread()) { | |
| 904 Self->clear_unhandled_oops(); | |
| 905 } | |
| 906 #endif // CHECK_UNHANDLED_OOPS | |
| 907 | |
| 908 debug_only(check_prelock_state(Self)); | |
| 909 assert (_owner != Self , "invariant") ; | |
| 910 assert (_OnDeck != Self->_MutexEvent, "invariant") ; | |
| 911 | |
| 912 if (TryFast()) { | |
| 913 Exeunt: | |
| 914 assert (ILocked(), "invariant") ; | |
| 915 assert (owner() == NULL, "invariant"); | |
| 916 set_owner (Self); | |
| 917 return ; | |
| 918 } | |
| 919 | |
| 920 // The lock is contended ... | |
| 921 | |
| 922 bool can_sneak = Self->is_VM_thread() && SafepointSynchronize::is_at_safepoint(); | |
| 923 if (can_sneak && _owner == NULL) { | |
| 924 // a java thread has locked the lock but has not entered the | |
| 925 // critical region -- let's just pretend we've locked the lock | |
| 926 // and go on. we note this with _snuck so we can also | |
| 927 // pretend to unlock when the time comes. | |
| 928 _snuck = true; | |
| 929 goto Exeunt ; | |
| 930 } | |
| 931 | |
| 932 // Try a brief spin to avoid passing thru thread state transition ... | |
| 933 if (TrySpin (Self)) goto Exeunt ; | |
| 934 | |
| 935 check_block_state(Self); | |
| 936 if (Self->is_Java_thread()) { | |
| 937 // Horribile dictu - we suffer through a state transition | |
| 938 assert(rank() > Mutex::special, "Potential deadlock with special or lesser rank mutex"); | |
| 939 ThreadBlockInVM tbivm ((JavaThread *) Self) ; | |
| 940 ILock (Self) ; | |
| 941 } else { | |
| 942 // Mirabile dictu | |
| 943 ILock (Self) ; | |
| 944 } | |
| 945 goto Exeunt ; | |
| 946 } | |
| 947 | |
| 948 void Monitor::lock() { | |
| 949 this->lock(Thread::current()); | |
| 950 } | |
| 951 | |
| 952 // Lock without safepoint check - a degenerate variant of lock(). | |
| 953 // Should ONLY be used by safepoint code and other code | |
| 954 // that is guaranteed not to block while running inside the VM. If this is called with | |
| 955 // thread state set to be in VM, the safepoint synchronization code will deadlock! | |
| 956 | |
| 957 void Monitor::lock_without_safepoint_check (Thread * Self) { | |
| 958 assert (_owner != Self, "invariant") ; | |
| 959 ILock (Self) ; | |
| 960 assert (_owner == NULL, "invariant"); | |
| 961 set_owner (Self); | |
| 962 } | |
| 963 | |
| 964 void Monitor::lock_without_safepoint_check () { | |
| 965 lock_without_safepoint_check (Thread::current()) ; | |
| 966 } | |
| 967 | |
| 968 | |
| 969 // Returns true if thread succeceed [sic] in grabbing the lock, otherwise false. | |
| 970 | |
| 971 bool Monitor::try_lock() { | |
| 972 Thread * const Self = Thread::current(); | |
| 973 debug_only(check_prelock_state(Self)); | |
| 974 // assert(!thread->is_inside_signal_handler(), "don't lock inside signal handler"); | |
| 975 | |
| 976 // Special case, where all Java threads are stopped. | |
| 977 // The lock may have been acquired but _owner is not yet set. | |
| 978 // In that case the VM thread can safely grab the lock. | |
| 979 // It strikes me this should appear _after the TryLock() fails, below. | |
| 980 bool can_sneak = Self->is_VM_thread() && SafepointSynchronize::is_at_safepoint(); | |
| 981 if (can_sneak && _owner == NULL) { | |
| 982 set_owner(Self); // Do not need to be atomic, since we are at a safepoint | |
| 983 _snuck = true; | |
| 984 return true; | |
| 985 } | |
| 986 | |
| 987 if (TryLock()) { | |
| 988 // We got the lock | |
| 989 assert (_owner == NULL, "invariant"); | |
| 990 set_owner (Self); | |
| 991 return true; | |
| 992 } | |
| 993 return false; | |
| 994 } | |
| 995 | |
| 996 void Monitor::unlock() { | |
| 997 assert (_owner == Thread::current(), "invariant") ; | |
| 998 assert (_OnDeck != Thread::current()->_MutexEvent , "invariant") ; | |
| 999 set_owner (NULL) ; | |
| 1000 if (_snuck) { | |
| 1001 assert(SafepointSynchronize::is_at_safepoint() && Thread::current()->is_VM_thread(), "sneak"); | |
| 1002 _snuck = false; | |
| 1003 return ; | |
| 1004 } | |
| 1005 IUnlock (false) ; | |
| 1006 } | |
| 1007 | |
| 1008 // Yet another degenerate version of Monitor::lock() or lock_without_safepoint_check() | |
| 1009 // jvm_raw_lock() and _unlock() can be called by non-Java threads via JVM_RawMonitorEnter. | |
| 1010 // | |
| 1011 // There's no expectation that JVM_RawMonitors will interoperate properly with the native | |
| 1012 // Mutex-Monitor constructs. We happen to implement JVM_RawMonitors in terms of | |
| 1013 // native Mutex-Monitors simply as a matter of convenience. A simple abstraction layer | |
| 1014 // over a pthread_mutex_t would work equally as well, but require more platform-specific | |
| 1015 // code -- a "PlatformMutex". Alternatively, a simply layer over muxAcquire-muxRelease | |
| 1016 // would work too. | |
| 1017 // | |
| 1018 // Since the caller might be a foreign thread, we don't necessarily have a Thread.MutexEvent | |
| 1019 // instance available. Instead, we transiently allocate a ParkEvent on-demand if | |
| 1020 // we encounter contention. That ParkEvent remains associated with the thread | |
| 1021 // until it manages to acquire the lock, at which time we return the ParkEvent | |
| 1022 // to the global ParkEvent free list. This is correct and suffices for our purposes. | |
| 1023 // | |
| 1024 // Beware that the original jvm_raw_unlock() had a "_snuck" test but that | |
| 1025 // jvm_raw_lock() didn't have the corresponding test. I suspect that's an | |
| 1026 // oversight, but I've replicated the original suspect logic in the new code ... | |
| 1027 | |
| 1028 void Monitor::jvm_raw_lock() { | |
| 1029 assert(rank() == native, "invariant"); | |
| 1030 | |
| 1031 if (TryLock()) { | |
| 1032 Exeunt: | |
| 1033 assert (ILocked(), "invariant") ; | |
| 1034 assert (_owner == NULL, "invariant"); | |
| 1035 // This can potentially be called by non-java Threads. Thus, the ThreadLocalStorage | |
| 1036 // might return NULL. Don't call set_owner since it will break on an NULL owner | |
| 1037 // Consider installing a non-null "ANON" distinguished value instead of just NULL. | |
| 1038 _owner = ThreadLocalStorage::thread(); | |
| 1039 return ; | |
| 1040 } | |
| 1041 | |
| 1042 if (TrySpin(NULL)) goto Exeunt ; | |
| 1043 | |
| 1044 // slow-path - apparent contention | |
| 1045 // Allocate a ParkEvent for transient use. | |
| 1046 // The ParkEvent remains associated with this thread until | |
| 1047 // the time the thread manages to acquire the lock. | |
| 1048 ParkEvent * const ESelf = ParkEvent::Allocate(NULL) ; | |
| 1049 ESelf->reset() ; | |
| 1050 OrderAccess::storeload() ; | |
| 1051 | |
| 1052 // Either Enqueue Self on cxq or acquire the outer lock. | |
| 1053 if (AcquireOrPush (ESelf)) { | |
| 1054 ParkEvent::Release (ESelf) ; // surrender the ParkEvent | |
| 1055 goto Exeunt ; | |
| 1056 } | |
| 1057 | |
| 1058 // At any given time there is at most one ondeck thread. | |
| 1059 // ondeck implies not resident on cxq and not resident on EntryList | |
| 1060 // Only the OnDeck thread can try to acquire -- contended for -- the lock. | |
| 1061 // CONSIDER: use Self->OnDeck instead of m->OnDeck. | |
| 1062 for (;;) { | |
| 1063 if (_OnDeck == ESelf && TrySpin(NULL)) break ; | |
| 1064 ParkCommon (ESelf, 0) ; | |
| 1065 } | |
| 1066 | |
| 1067 assert (_OnDeck == ESelf, "invariant") ; | |
| 1068 _OnDeck = NULL ; | |
| 1069 ParkEvent::Release (ESelf) ; // surrender the ParkEvent | |
| 1070 goto Exeunt ; | |
| 1071 } | |
| 1072 | |
| 1073 void Monitor::jvm_raw_unlock() { | |
| 1074 // Nearly the same as Monitor::unlock() ... | |
| 1075 // directly set _owner instead of using set_owner(null) | |
| 1076 _owner = NULL ; | |
| 1077 if (_snuck) { // ??? | |
| 1078 assert(SafepointSynchronize::is_at_safepoint() && Thread::current()->is_VM_thread(), "sneak"); | |
| 1079 _snuck = false; | |
| 1080 return ; | |
| 1081 } | |
| 1082 IUnlock(false) ; | |
| 1083 } | |
| 1084 | |
| 1085 bool Monitor::wait(bool no_safepoint_check, long timeout, bool as_suspend_equivalent) { | |
| 1086 Thread * const Self = Thread::current() ; | |
| 1087 assert (_owner == Self, "invariant") ; | |
| 1088 assert (ILocked(), "invariant") ; | |
| 1089 | |
| 1090 // as_suspend_equivalent logically implies !no_safepoint_check | |
| 1091 guarantee (!as_suspend_equivalent || !no_safepoint_check, "invariant") ; | |
| 1092 // !no_safepoint_check logically implies java_thread | |
| 1093 guarantee (no_safepoint_check || Self->is_Java_thread(), "invariant") ; | |
| 1094 | |
| 1095 #ifdef ASSERT | |
| 1096 Monitor * least = get_least_ranked_lock_besides_this(Self->owned_locks()); | |
| 1097 assert(least != this, "Specification of get_least_... call above"); | |
| 1098 if (least != NULL && least->rank() <= special) { | |
| 1099 tty->print("Attempting to wait on monitor %s/%d while holding" | |
| 1100 " lock %s/%d -- possible deadlock", | |
| 1101 name(), rank(), least->name(), least->rank()); | |
| 1102 assert(false, "Shouldn't block(wait) while holding a lock of rank special"); | |
| 1103 } | |
| 1104 #endif // ASSERT | |
| 1105 | |
| 1106 int wait_status ; | |
| 1107 // conceptually set the owner to NULL in anticipation of | |
| 1108 // abdicating the lock in wait | |
| 1109 set_owner(NULL); | |
| 1110 if (no_safepoint_check) { | |
| 1111 wait_status = IWait (Self, timeout) ; | |
| 1112 } else { | |
| 1113 assert (Self->is_Java_thread(), "invariant") ; | |
| 1114 JavaThread *jt = (JavaThread *)Self; | |
| 1115 | |
| 1116 // Enter safepoint region - ornate and Rococo ... | |
| 1117 ThreadBlockInVM tbivm(jt); | |
| 1118 OSThreadWaitState osts(Self->osthread(), false /* not Object.wait() */); | |
| 1119 | |
| 1120 if (as_suspend_equivalent) { | |
| 1121 jt->set_suspend_equivalent(); | |
| 1122 // cleared by handle_special_suspend_equivalent_condition() or | |
| 1123 // java_suspend_self() | |
| 1124 } | |
| 1125 | |
| 1126 wait_status = IWait (Self, timeout) ; | |
| 1127 | |
| 1128 // were we externally suspended while we were waiting? | |
| 1129 if (as_suspend_equivalent && jt->handle_special_suspend_equivalent_condition()) { | |
| 1130 // Our event wait has finished and we own the lock, but | |
| 1131 // while we were waiting another thread suspended us. We don't | |
| 1132 // want to hold the lock while suspended because that | |
| 1133 // would surprise the thread that suspended us. | |
| 1134 assert (ILocked(), "invariant") ; | |
| 1135 IUnlock (true) ; | |
| 1136 jt->java_suspend_self(); | |
| 1137 ILock (Self) ; | |
| 1138 assert (ILocked(), "invariant") ; | |
| 1139 } | |
| 1140 } | |
| 1141 | |
| 1142 // Conceptually reestablish ownership of the lock. | |
| 1143 // The "real" lock -- the LockByte -- was reacquired by IWait(). | |
| 1144 assert (ILocked(), "invariant") ; | |
| 1145 assert (_owner == NULL, "invariant") ; | |
| 1146 set_owner (Self) ; | |
| 1147 return wait_status != 0 ; // return true IFF timeout | |
| 1148 } | |
| 1149 | |
| 1150 Monitor::~Monitor() { | |
| 1151 assert ((UNS(_owner)|UNS(_LockWord.FullWord)|UNS(_EntryList)|UNS(_WaitSet)|UNS(_OnDeck)) == 0, "") ; | |
| 1152 } | |
| 1153 | |
|
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1154 void Monitor::ClearMonitor (Monitor * m, const char *name) { |
| 0 | 1155 m->_owner = NULL ; |
| 1156 m->_snuck = false ; | |
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1157 if (name == NULL) { |
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1158 strcpy(m->_name, "UNKNOWN") ; |
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1159 } else { |
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1160 strncpy(m->_name, name, MONITOR_NAME_LEN - 1); |
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1161 m->_name[MONITOR_NAME_LEN - 1] = '\0'; |
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1162 } |
| 0 | 1163 m->_LockWord.FullWord = 0 ; |
| 1164 m->_EntryList = NULL ; | |
| 1165 m->_OnDeck = NULL ; | |
| 1166 m->_WaitSet = NULL ; | |
| 1167 m->_WaitLock[0] = 0 ; | |
| 1168 } | |
| 1169 | |
| 1170 Monitor::Monitor() { ClearMonitor(this); } | |
| 1171 | |
| 1172 Monitor::Monitor (int Rank, const char * name, bool allow_vm_block) { | |
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1173 ClearMonitor (this, name) ; |
| 0 | 1174 #ifdef ASSERT |
| 1175 _allow_vm_block = allow_vm_block; | |
| 1176 _rank = Rank ; | |
| 1177 #endif | |
| 1178 } | |
| 1179 | |
| 1180 Mutex::~Mutex() { | |
| 1181 assert ((UNS(_owner)|UNS(_LockWord.FullWord)|UNS(_EntryList)|UNS(_WaitSet)|UNS(_OnDeck)) == 0, "") ; | |
| 1182 } | |
| 1183 | |
| 1184 Mutex::Mutex (int Rank, const char * name, bool allow_vm_block) { | |
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1185 ClearMonitor ((Monitor *) this, name) ; |
| 0 | 1186 #ifdef ASSERT |
| 1187 _allow_vm_block = allow_vm_block; | |
| 1188 _rank = Rank ; | |
| 1189 #endif | |
| 1190 } | |
| 1191 | |
| 1192 bool Monitor::owned_by_self() const { | |
| 1193 bool ret = _owner == Thread::current(); | |
| 1194 assert (!ret || _LockWord.Bytes[_LSBINDEX] != 0, "invariant") ; | |
| 1195 return ret; | |
| 1196 } | |
| 1197 | |
| 1198 void Monitor::print_on_error(outputStream* st) const { | |
| 1199 st->print("[" PTR_FORMAT, this); | |
| 1200 st->print("] %s", _name); | |
| 1201 st->print(" - owner thread: " PTR_FORMAT, _owner); | |
| 1202 } | |
| 1203 | |
| 1204 | |
| 1205 | |
| 1206 | |
| 1207 // ---------------------------------------------------------------------------------- | |
| 1208 // Non-product code | |
| 1209 | |
| 1210 #ifndef PRODUCT | |
| 1211 void Monitor::print_on(outputStream* st) const { | |
| 1212 st->print_cr("Mutex: [0x%lx/0x%lx] %s - owner: 0x%lx", this, _LockWord.FullWord, _name, _owner); | |
| 1213 } | |
| 1214 #endif | |
| 1215 | |
| 1216 #ifndef PRODUCT | |
| 1217 #ifdef ASSERT | |
| 1218 Monitor * Monitor::get_least_ranked_lock(Monitor * locks) { | |
| 1219 Monitor *res, *tmp; | |
| 1220 for (res = tmp = locks; tmp != NULL; tmp = tmp->next()) { | |
| 1221 if (tmp->rank() < res->rank()) { | |
| 1222 res = tmp; | |
| 1223 } | |
| 1224 } | |
| 1225 if (!SafepointSynchronize::is_at_safepoint()) { | |
| 1226 // In this case, we expect the held locks to be | |
| 1227 // in increasing rank order (modulo any native ranks) | |
| 1228 for (tmp = locks; tmp != NULL; tmp = tmp->next()) { | |
| 1229 if (tmp->next() != NULL) { | |
| 1230 assert(tmp->rank() == Mutex::native || | |
| 1231 tmp->rank() <= tmp->next()->rank(), "mutex rank anomaly?"); | |
| 1232 } | |
| 1233 } | |
| 1234 } | |
| 1235 return res; | |
| 1236 } | |
| 1237 | |
| 1238 Monitor* Monitor::get_least_ranked_lock_besides_this(Monitor* locks) { | |
| 1239 Monitor *res, *tmp; | |
| 1240 for (res = NULL, tmp = locks; tmp != NULL; tmp = tmp->next()) { | |
| 1241 if (tmp != this && (res == NULL || tmp->rank() < res->rank())) { | |
| 1242 res = tmp; | |
| 1243 } | |
| 1244 } | |
| 1245 if (!SafepointSynchronize::is_at_safepoint()) { | |
| 1246 // In this case, we expect the held locks to be | |
| 1247 // in increasing rank order (modulo any native ranks) | |
| 1248 for (tmp = locks; tmp != NULL; tmp = tmp->next()) { | |
| 1249 if (tmp->next() != NULL) { | |
| 1250 assert(tmp->rank() == Mutex::native || | |
| 1251 tmp->rank() <= tmp->next()->rank(), "mutex rank anomaly?"); | |
| 1252 } | |
| 1253 } | |
| 1254 } | |
| 1255 return res; | |
| 1256 } | |
| 1257 | |
| 1258 | |
| 1259 bool Monitor::contains(Monitor* locks, Monitor * lock) { | |
| 1260 for (; locks != NULL; locks = locks->next()) { | |
| 1261 if (locks == lock) | |
| 1262 return true; | |
| 1263 } | |
| 1264 return false; | |
| 1265 } | |
| 1266 #endif | |
| 1267 | |
| 1268 // Called immediately after lock acquisition or release as a diagnostic | |
| 1269 // to track the lock-set of the thread and test for rank violations that | |
| 1270 // might indicate exposure to deadlock. | |
| 1271 // Rather like an EventListener for _owner (:>). | |
| 1272 | |
| 1273 void Monitor::set_owner_implementation(Thread *new_owner) { | |
| 1274 // This function is solely responsible for maintaining | |
| 1275 // and checking the invariant that threads and locks | |
| 1276 // are in a 1/N relation, with some some locks unowned. | |
| 1277 // It uses the Mutex::_owner, Mutex::_next, and | |
| 1278 // Thread::_owned_locks fields, and no other function | |
| 1279 // changes those fields. | |
| 1280 // It is illegal to set the mutex from one non-NULL | |
| 1281 // owner to another--it must be owned by NULL as an | |
| 1282 // intermediate state. | |
| 1283 | |
| 1284 if (new_owner != NULL) { | |
| 1285 // the thread is acquiring this lock | |
| 1286 | |
| 1287 assert(new_owner == Thread::current(), "Should I be doing this?"); | |
| 1288 assert(_owner == NULL, "setting the owner thread of an already owned mutex"); | |
| 1289 _owner = new_owner; // set the owner | |
| 1290 | |
| 1291 // link "this" into the owned locks list | |
| 1292 | |
| 1293 #ifdef ASSERT // Thread::_owned_locks is under the same ifdef | |
| 1294 Monitor* locks = get_least_ranked_lock(new_owner->owned_locks()); | |
| 1295 // Mutex::set_owner_implementation is a friend of Thread | |
| 1296 | |
| 1297 assert(this->rank() >= 0, "bad lock rank"); | |
| 1298 | |
| 1299 // Deadlock avoidance rules require us to acquire Mutexes only in | |
| 1300 // a global total order. For example m1 is the lowest ranked mutex | |
| 1301 // that the thread holds and m2 is the mutex the thread is trying | |
| 1302 // to acquire, then deadlock avoidance rules require that the rank | |
| 1303 // of m2 be less than the rank of m1. | |
| 1304 // The rank Mutex::native is an exception in that it is not subject | |
| 1305 // to the verification rules. | |
| 1306 // Here are some further notes relating to mutex acquisition anomalies: | |
| 1307 // . under Solaris, the interrupt lock gets acquired when doing | |
| 1308 // profiling, so any lock could be held. | |
| 1309 // . it is also ok to acquire Safepoint_lock at the very end while we | |
| 1310 // already hold Terminator_lock - may happen because of periodic safepoints | |
| 1311 if (this->rank() != Mutex::native && | |
| 1312 this->rank() != Mutex::suspend_resume && | |
| 1313 locks != NULL && locks->rank() <= this->rank() && | |
| 1314 !SafepointSynchronize::is_at_safepoint() && | |
| 1315 this != Interrupt_lock && this != ProfileVM_lock && | |
| 1316 !(this == Safepoint_lock && contains(locks, Terminator_lock) && | |
| 1317 SafepointSynchronize::is_synchronizing())) { | |
| 1318 new_owner->print_owned_locks(); | |
|
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1319 fatal(err_msg("acquiring lock %s/%d out of order with lock %s/%d -- " |
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1320 "possible deadlock", this->name(), this->rank(), |
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1321 locks->name(), locks->rank())); |
| 0 | 1322 } |
| 1323 | |
| 1324 this->_next = new_owner->_owned_locks; | |
| 1325 new_owner->_owned_locks = this; | |
| 1326 #endif | |
| 1327 | |
| 1328 } else { | |
| 1329 // the thread is releasing this lock | |
| 1330 | |
| 1331 Thread* old_owner = _owner; | |
| 1332 debug_only(_last_owner = old_owner); | |
| 1333 | |
| 1334 assert(old_owner != NULL, "removing the owner thread of an unowned mutex"); | |
| 1335 assert(old_owner == Thread::current(), "removing the owner thread of an unowned mutex"); | |
| 1336 | |
| 1337 _owner = NULL; // set the owner | |
| 1338 | |
| 1339 #ifdef ASSERT | |
| 1340 Monitor *locks = old_owner->owned_locks(); | |
| 1341 | |
| 1342 // remove "this" from the owned locks list | |
| 1343 | |
| 1344 Monitor *prev = NULL; | |
| 1345 bool found = false; | |
| 1346 for (; locks != NULL; prev = locks, locks = locks->next()) { | |
| 1347 if (locks == this) { | |
| 1348 found = true; | |
| 1349 break; | |
| 1350 } | |
| 1351 } | |
| 1352 assert(found, "Removing a lock not owned"); | |
| 1353 if (prev == NULL) { | |
| 1354 old_owner->_owned_locks = _next; | |
| 1355 } else { | |
| 1356 prev->_next = _next; | |
| 1357 } | |
| 1358 _next = NULL; | |
| 1359 #endif | |
| 1360 } | |
| 1361 } | |
| 1362 | |
| 1363 | |
| 1364 // Factored out common sanity checks for locking mutex'es. Used by lock() and try_lock() | |
| 1365 void Monitor::check_prelock_state(Thread *thread) { | |
| 1366 assert((!thread->is_Java_thread() || ((JavaThread *)thread)->thread_state() == _thread_in_vm) | |
| 1367 || rank() == Mutex::special, "wrong thread state for using locks"); | |
| 1368 if (StrictSafepointChecks) { | |
| 1369 if (thread->is_VM_thread() && !allow_vm_block()) { | |
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1370 fatal(err_msg("VM thread using lock %s (not allowed to block on)", |
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1371 name())); |
| 0 | 1372 } |
| 1373 debug_only(if (rank() != Mutex::special) \ | |
| 1374 thread->check_for_valid_safepoint_state(false);) | |
| 1375 } | |
| 11151 | 1376 if (thread->is_Watcher_thread()) { |
| 1377 assert(!WatcherThread::watcher_thread()->has_crash_protection(), | |
| 1378 "locking not allowed when crash protection is set"); | |
| 1379 } | |
| 0 | 1380 } |
| 1381 | |
| 1382 void Monitor::check_block_state(Thread *thread) { | |
| 1383 if (!_allow_vm_block && thread->is_VM_thread()) { | |
| 1384 warning("VM thread blocked on lock"); | |
| 1385 print(); | |
| 1386 BREAKPOINT; | |
| 1387 } | |
| 1388 assert(_owner != thread, "deadlock: blocking on monitor owned by current thread"); | |
| 1389 } | |
| 1390 | |
| 1391 #endif // PRODUCT |