Mercurial > hg > truffle
view src/share/vm/runtime/orderAccess.hpp @ 3273:df22fe9c5a93
Merge
author | coleenp |
---|---|
date | Wed, 27 Apr 2011 17:25:45 -0700 |
parents | f95d63e2154a |
children | 63a4eb8bcd23 |
line wrap: on
line source
/* * Copyright (c) 2003, 2010, Oracle and/or its affiliates. All rights reserved. * DO NOT ALTER OR REMOVE COPYRIGHT NOTICES OR THIS FILE HEADER. * * This code is free software; you can redistribute it and/or modify it * under the terms of the GNU General Public License version 2 only, as * published by the Free Software Foundation. * * This code is distributed in the hope that it will be useful, but WITHOUT * ANY WARRANTY; without even the implied warranty of MERCHANTABILITY or * FITNESS FOR A PARTICULAR PURPOSE. See the GNU General Public License * version 2 for more details (a copy is included in the LICENSE file that * accompanied this code). * * You should have received a copy of the GNU General Public License version * 2 along with this work; if not, write to the Free Software Foundation, * Inc., 51 Franklin St, Fifth Floor, Boston, MA 02110-1301 USA. * * Please contact Oracle, 500 Oracle Parkway, Redwood Shores, CA 94065 USA * or visit www.oracle.com if you need additional information or have any * questions. * */ #ifndef SHARE_VM_RUNTIME_ORDERACCESS_HPP #define SHARE_VM_RUNTIME_ORDERACCESS_HPP #include "memory/allocation.hpp" // Memory Access Ordering Model // // This interface is based on the JSR-133 Cookbook for Compiler Writers // and on the IA64 memory model. It is the dynamic equivalent of the // C/C++ volatile specifier. I.e., volatility restricts compile-time // memory access reordering in a way similar to what we want to occur // at runtime. // // In the following, the terms 'previous', 'subsequent', 'before', // 'after', 'preceding' and 'succeeding' refer to program order. The // terms 'down' and 'below' refer to forward load or store motion // relative to program order, while 'up' and 'above' refer to backward // motion. // // // We define four primitive memory barrier operations. // // LoadLoad: Load1(s); LoadLoad; Load2 // // Ensures that Load1 completes (obtains the value it loads from memory) // before Load2 and any subsequent load operations. Loads before Load1 // may *not* float below Load2 and any subsequent load operations. // // StoreStore: Store1(s); StoreStore; Store2 // // Ensures that Store1 completes (the effect on memory of Store1 is made // visible to other processors) before Store2 and any subsequent store // operations. Stores before Store1 may *not* float below Store2 and any // subsequent store operations. // // LoadStore: Load1(s); LoadStore; Store2 // // Ensures that Load1 completes before Store2 and any subsequent store // operations. Loads before Load1 may *not* float below Store2 and any // subseqeuent store operations. // // StoreLoad: Store1(s); StoreLoad; Load2 // // Ensures that Store1 completes before Load2 and any subsequent load // operations. Stores before Store1 may *not* float below Load2 and any // subseqeuent load operations. // // // We define two further operations, 'release' and 'acquire'. They are // mirror images of each other. // // Execution by a processor of release makes the effect of all memory // accesses issued by it previous to the release visible to all // processors *before* the release completes. The effect of subsequent // memory accesses issued by it *may* be made visible *before* the // release. I.e., subsequent memory accesses may float above the // release, but prior ones may not float below it. // // Execution by a processor of acquire makes the effect of all memory // accesses issued by it subsequent to the acquire visible to all // processors *after* the acquire completes. The effect of prior memory // accesses issued by it *may* be made visible *after* the acquire. // I.e., prior memory accesses may float below the acquire, but // subsequent ones may not float above it. // // Finally, we define a 'fence' operation, which conceptually is a // release combined with an acquire. In the real world these operations // require one or more machine instructions which can float above and // below the release or acquire, so we usually can't just issue the // release-acquire back-to-back. All machines we know of implement some // sort of memory fence instruction. // // // The standalone implementations of release and acquire need an associated // dummy volatile store or load respectively. To avoid redundant operations, // we can define the composite operators: 'release_store', 'store_fence' and // 'load_acquire'. Here's a summary of the machine instructions corresponding // to each operation. // // sparc RMO ia64 x86 // --------------------------------------------------------------------- // fence membar #LoadStore | mf lock addl 0,(sp) // #StoreStore | // #LoadLoad | // #StoreLoad // // release membar #LoadStore | st.rel [sp]=r0 movl $0,<dummy> // #StoreStore // st %g0,[] // // acquire ld [%sp],%g0 ld.acq <r>=[sp] movl (sp),<r> // membar #LoadLoad | // #LoadStore // // release_store membar #LoadStore | st.rel <store> // #StoreStore // st // // store_fence st st lock xchg // fence mf // // load_acquire ld ld.acq <load> // membar #LoadLoad | // #LoadStore // // Using only release_store and load_acquire, we can implement the // following ordered sequences. // // 1. load, load == load_acquire, load // or load_acquire, load_acquire // 2. load, store == load, release_store // or load_acquire, store // or load_acquire, release_store // 3. store, store == store, release_store // or release_store, release_store // // These require no membar instructions for sparc-TSO and no extra // instructions for ia64. // // Ordering a load relative to preceding stores requires a store_fence, // which implies a membar #StoreLoad between the store and load under // sparc-TSO. A fence is required by ia64. On x86, we use locked xchg. // // 4. store, load == store_fence, load // // Use store_fence to make sure all stores done in an 'interesting' // region are made visible prior to both subsequent loads and stores. // // Conventional usage is to issue a load_acquire for ordered loads. Use // release_store for ordered stores when you care only that prior stores // are visible before the release_store, but don't care exactly when the // store associated with the release_store becomes visible. Use // release_store_fence to update values like the thread state, where we // don't want the current thread to continue until all our prior memory // accesses (including the new thread state) are visible to other threads. // // // C++ Volatility // // C++ guarantees ordering at operations termed 'sequence points' (defined // to be volatile accesses and calls to library I/O functions). 'Side // effects' (defined as volatile accesses, calls to library I/O functions // and object modification) previous to a sequence point must be visible // at that sequence point. See the C++ standard, section 1.9, titled // "Program Execution". This means that all barrier implementations, // including standalone loadload, storestore, loadstore, storeload, acquire // and release must include a sequence point, usually via a volatile memory // access. Other ways to guarantee a sequence point are, e.g., use of // indirect calls and linux's __asm__ volatile. // Note: as of 6973570, we have replaced the originally static "dummy" field // (see above) by a volatile store to the stack. All of the versions of the // compilers that we currently use (SunStudio, gcc and VC++) respect the // semantics of volatile here. If you build HotSpot using other // compilers, you may need to verify that no compiler reordering occurs // across the sequence point respresented by the volatile access. // // // os::is_MP Considered Redundant // // Callers of this interface do not need to test os::is_MP() before // issuing an operation. The test is taken care of by the implementation // of the interface (depending on the vm version and platform, the test // may or may not be actually done by the implementation). // // // A Note on Memory Ordering and Cache Coherency // // Cache coherency and memory ordering are orthogonal concepts, though they // interact. E.g., all existing itanium machines are cache-coherent, but // the hardware can freely reorder loads wrt other loads unless it sees a // load-acquire instruction. All existing sparc machines are cache-coherent // and, unlike itanium, TSO guarantees that the hardware orders loads wrt // loads and stores, and stores wrt to each other. // // Consider the implementation of loadload. *If* your platform *isn't* // cache-coherent, then loadload must not only prevent hardware load // instruction reordering, but it must *also* ensure that subsequent // loads from addresses that could be written by other processors (i.e., // that are broadcast by other processors) go all the way to the first // level of memory shared by those processors and the one issuing // the loadload. // // So if we have a MP that has, say, a per-processor D$ that doesn't see // writes by other processors, and has a shared E$ that does, the loadload // barrier would have to make sure that either // // 1. cache lines in the issuing processor's D$ that contained data from // addresses that could be written by other processors are invalidated, so // subsequent loads from those addresses go to the E$, (it could do this // by tagging such cache lines as 'shared', though how to tell the hardware // to do the tagging is an interesting problem), or // // 2. there never are such cache lines in the issuing processor's D$, which // means all references to shared data (however identified: see above) // bypass the D$ (i.e., are satisfied from the E$). // // If your machine doesn't have an E$, substitute 'main memory' for 'E$'. // // Either of these alternatives is a pain, so no current machine we know of // has incoherent caches. // // If loadload didn't have these properties, the store-release sequence for // publishing a shared data structure wouldn't work, because a processor // trying to read data newly published by another processor might go to // its own incoherent caches to satisfy the read instead of to the newly // written shared memory. // // // NOTE WELL!! // // A Note on MutexLocker and Friends // // See mutexLocker.hpp. We assume throughout the VM that MutexLocker's // and friends' constructors do a fence, a lock and an acquire *in that // order*. And that their destructors do a release and unlock, in *that* // order. If their implementations change such that these assumptions // are violated, a whole lot of code will break. class OrderAccess : AllStatic { public: static void loadload(); static void storestore(); static void loadstore(); static void storeload(); static void acquire(); static void release(); static void fence(); static jbyte load_acquire(volatile jbyte* p); static jshort load_acquire(volatile jshort* p); static jint load_acquire(volatile jint* p); static jlong load_acquire(volatile jlong* p); static jubyte load_acquire(volatile jubyte* p); static jushort load_acquire(volatile jushort* p); static juint load_acquire(volatile juint* p); static julong load_acquire(volatile julong* p); static jfloat load_acquire(volatile jfloat* p); static jdouble load_acquire(volatile jdouble* p); static intptr_t load_ptr_acquire(volatile intptr_t* p); static void* load_ptr_acquire(volatile void* p); static void* load_ptr_acquire(const volatile void* p); static void release_store(volatile jbyte* p, jbyte v); static void release_store(volatile jshort* p, jshort v); static void release_store(volatile jint* p, jint v); static void release_store(volatile jlong* p, jlong v); static void release_store(volatile jubyte* p, jubyte v); static void release_store(volatile jushort* p, jushort v); static void release_store(volatile juint* p, juint v); static void release_store(volatile julong* p, julong v); static void release_store(volatile jfloat* p, jfloat v); static void release_store(volatile jdouble* p, jdouble v); static void release_store_ptr(volatile intptr_t* p, intptr_t v); static void release_store_ptr(volatile void* p, void* v); static void store_fence(jbyte* p, jbyte v); static void store_fence(jshort* p, jshort v); static void store_fence(jint* p, jint v); static void store_fence(jlong* p, jlong v); static void store_fence(jubyte* p, jubyte v); static void store_fence(jushort* p, jushort v); static void store_fence(juint* p, juint v); static void store_fence(julong* p, julong v); static void store_fence(jfloat* p, jfloat v); static void store_fence(jdouble* p, jdouble v); static void store_ptr_fence(intptr_t* p, intptr_t v); static void store_ptr_fence(void** p, void* v); static void release_store_fence(volatile jbyte* p, jbyte v); static void release_store_fence(volatile jshort* p, jshort v); static void release_store_fence(volatile jint* p, jint v); static void release_store_fence(volatile jlong* p, jlong v); static void release_store_fence(volatile jubyte* p, jubyte v); static void release_store_fence(volatile jushort* p, jushort v); static void release_store_fence(volatile juint* p, juint v); static void release_store_fence(volatile julong* p, julong v); static void release_store_fence(volatile jfloat* p, jfloat v); static void release_store_fence(volatile jdouble* p, jdouble v); static void release_store_ptr_fence(volatile intptr_t* p, intptr_t v); static void release_store_ptr_fence(volatile void* p, void* v); private: // This is a helper that invokes the StubRoutines::fence_entry() // routine if it exists, It should only be used by platforms that // don't another way to do the inline eassembly. static void StubRoutines_fence(); }; #endif // SHARE_VM_RUNTIME_ORDERACCESS_HPP