URL
https://opencores.org/ocsvn/openrisc/openrisc/trunk
Subversion Repositories openrisc
[/] [openrisc/] [trunk/] [gnu-dev/] [or1k-gcc/] [libitm/] [method-ml.cc] - Rev 745
Go to most recent revision | Compare with Previous | Blame | View Log
/* Copyright (C) 2012 Free Software Foundation, Inc. Contributed by Torvald Riegel <triegel@redhat.com>. This file is part of the GNU Transactional Memory Library (libitm). Libitm is free software; you can redistribute it and/or modify it under the terms of the GNU General Public License as published by the Free Software Foundation; either version 3 of the License, or (at your option) any later version. Libitm 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 for more details. Under Section 7 of GPL version 3, you are granted additional permissions described in the GCC Runtime Library Exception, version 3.1, as published by the Free Software Foundation. You should have received a copy of the GNU General Public License and a copy of the GCC Runtime Library Exception along with this program; see the files COPYING3 and COPYING.RUNTIME respectively. If not, see <http://www.gnu.org/licenses/>. */ #include "libitm_i.h" using namespace GTM; namespace { // This group consists of all TM methods that synchronize via multiple locks // (or ownership records). struct ml_mg : public method_group { static const gtm_word LOCK_BIT = (~(gtm_word)0 >> 1) + 1; static const gtm_word INCARNATION_BITS = 3; static const gtm_word INCARNATION_MASK = 7; // Maximum time is all bits except the lock bit, the overflow reserve bit, // and the incarnation bits). static const gtm_word TIME_MAX = (~(gtm_word)0 >> (2 + INCARNATION_BITS)); // The overflow reserve bit is the MSB of the timestamp part of an orec, // so we can have TIME_MAX+1 pending timestamp increases before we overflow. static const gtm_word OVERFLOW_RESERVE = TIME_MAX + 1; static bool is_locked(gtm_word o) { return o & LOCK_BIT; } static gtm_word set_locked(gtm_thread *tx) { return ((uintptr_t)tx >> 1) | LOCK_BIT; } // Returns a time that includes the lock bit, which is required by both // validate() and is_more_recent_or_locked(). static gtm_word get_time(gtm_word o) { return o >> INCARNATION_BITS; } static gtm_word set_time(gtm_word time) { return time << INCARNATION_BITS; } static bool is_more_recent_or_locked(gtm_word o, gtm_word than_time) { // LOCK_BIT is the MSB; thus, if O is locked, it is larger than TIME_MAX. return get_time(o) > than_time; } static bool has_incarnation_left(gtm_word o) { return (o & INCARNATION_MASK) < INCARNATION_MASK; } static gtm_word inc_incarnation(gtm_word o) { return o + 1; } // The shared time base. atomic<gtm_word> time __attribute__((aligned(HW_CACHELINE_SIZE))); // The array of ownership records. atomic<gtm_word>* orecs __attribute__((aligned(HW_CACHELINE_SIZE))); char tailpadding[HW_CACHELINE_SIZE - sizeof(atomic<gtm_word>*)]; // Location-to-orec mapping. Stripes of 16B mapped to 2^19 orecs. static const gtm_word L2O_ORECS = 1 << 19; static const gtm_word L2O_SHIFT = 4; static size_t get_orec(const void* addr) { return ((uintptr_t)addr >> L2O_SHIFT) & (L2O_ORECS - 1); } static size_t get_next_orec(size_t orec) { return (orec + 1) & (L2O_ORECS - 1); } // Returns the next orec after the region. static size_t get_orec_end(const void* addr, size_t len) { return (((uintptr_t)addr + len + (1 << L2O_SHIFT) - 1) >> L2O_SHIFT) & (L2O_ORECS - 1); } virtual void init() { // We assume that an atomic<gtm_word> is backed by just a gtm_word, so // starting with zeroed memory is fine. orecs = (atomic<gtm_word>*) xcalloc( sizeof(atomic<gtm_word>) * L2O_ORECS, true); // This store is only executed while holding the serial lock, so relaxed // memory order is sufficient here. time.store(0, memory_order_relaxed); } virtual void fini() { free(orecs); } // We only re-initialize when our time base overflows. Thus, only reset // the time base and the orecs but do not re-allocate the orec array. virtual void reinit() { // This store is only executed while holding the serial lock, so relaxed // memory order is sufficient here. Same holds for the memset. time.store(0, memory_order_relaxed); memset(orecs, 0, sizeof(atomic<gtm_word>) * L2O_ORECS); } }; static ml_mg o_ml_mg; // The multiple lock, write-through TM method. // Maps each memory location to one of the orecs in the orec array, and then // acquires the associated orec eagerly before writing through. // Writes require undo-logging because we are dealing with several locks/orecs // and need to resolve deadlocks if necessary by aborting one of the // transactions. // Reads do time-based validation with snapshot time extensions. Incarnation // numbers are used to decrease contention on the time base (with those, // aborted transactions do not need to acquire a new version number for the // data that has been previously written in the transaction and needs to be // rolled back). // gtm_thread::shared_state is used to store a transaction's current // snapshot time (or commit time). The serial lock uses ~0 for inactive // transactions and 0 for active ones. Thus, we always have a meaningful // timestamp in shared_state that can be used to implement quiescence-based // privatization safety. class ml_wt_dispatch : public abi_dispatch { protected: static void pre_write(gtm_thread *tx, const void *addr, size_t len) { gtm_word snapshot = tx->shared_state.load(memory_order_relaxed); gtm_word locked_by_tx = ml_mg::set_locked(tx); // Lock all orecs that cover the region. size_t orec = ml_mg::get_orec(addr); size_t orec_end = ml_mg::get_orec_end(addr, len); do { // Load the orec. Relaxed memory order is sufficient here because // either we have acquired the orec or we will try to acquire it with // a CAS with stronger memory order. gtm_word o = o_ml_mg.orecs[orec].load(memory_order_relaxed); // Check whether we have acquired the orec already. if (likely (locked_by_tx != o)) { // If not, acquire. Make sure that our snapshot time is larger or // equal than the orec's version to avoid masking invalidations of // our snapshot with our own writes. if (unlikely (ml_mg::is_locked(o))) tx->restart(RESTART_LOCKED_WRITE); if (unlikely (ml_mg::get_time(o) > snapshot)) { // We only need to extend the snapshot if we have indeed read // from this orec before. Given that we are an update // transaction, we will have to extend anyway during commit. // ??? Scan the read log instead, aborting if we have read // from data covered by this orec before? snapshot = extend(tx); } // We need acquire memory order here to synchronize with other // (ownership) releases of the orec. We do not need acq_rel order // because whenever another thread reads from this CAS' // modification, then it will abort anyway and does not rely on // any further happens-before relation to be established. if (unlikely (!o_ml_mg.orecs[orec].compare_exchange_strong( o, locked_by_tx, memory_order_acquire))) tx->restart(RESTART_LOCKED_WRITE); // We use an explicit fence here to avoid having to use release // memory order for all subsequent data stores. This fence will // synchronize with loads of the data with acquire memory order. // See post_load() for why this is necessary. // Adding require memory order to the prior CAS is not sufficient, // at least according to the Batty et al. formalization of the // memory model. atomic_thread_fence(memory_order_release); // We log the previous value here to be able to use incarnation // numbers when we have to roll back. // ??? Reserve capacity early to avoid capacity checks here? gtm_rwlog_entry *e = tx->writelog.push(); e->orec = o_ml_mg.orecs + orec; e->value = o; } orec = o_ml_mg.get_next_orec(orec); } while (orec != orec_end); // Do undo logging. We do not know which region prior writes logged // (even if orecs have been acquired), so just log everything. tx->undolog.log(addr, len); } static void pre_write(const void *addr, size_t len) { gtm_thread *tx = gtm_thr(); pre_write(tx, addr, len); } // Returns true iff all the orecs in our read log still have the same time // or have been locked by the transaction itself. static bool validate(gtm_thread *tx) { gtm_word locked_by_tx = ml_mg::set_locked(tx); // ??? This might get called from pre_load() via extend(). In that case, // we don't really need to check the new entries that pre_load() is // adding. Stop earlier? for (gtm_rwlog_entry *i = tx->readlog.begin(), *ie = tx->readlog.end(); i != ie; i++) { // Relaxed memory order is sufficient here because we do not need to // establish any new synchronizes-with relationships. We only need // to read a value that is as least as current as enforced by the // callers: extend() loads global time with acquire, and trycommit() // increments global time with acquire. Therefore, we will see the // most recent orec updates before the global time that we load. gtm_word o = i->orec->load(memory_order_relaxed); // We compare only the time stamp and the lock bit here. We know that // we have read only committed data before, so we can ignore // intermediate yet rolled-back updates presented by the incarnation // number bits. if (ml_mg::get_time(o) != ml_mg::get_time(i->value) && o != locked_by_tx) return false; } return true; } // Tries to extend the snapshot to a more recent time. Returns the new // snapshot time and updates TX->SHARED_STATE. If the snapshot cannot be // extended to the current global time, TX is restarted. static gtm_word extend(gtm_thread *tx) { // We read global time here, even if this isn't strictly necessary // because we could just return the maximum of the timestamps that // validate sees. However, the potential cache miss on global time is // probably a reasonable price to pay for avoiding unnecessary extensions // in the future. // We need acquire memory oder because we have to synchronize with the // increment of global time by update transactions, whose lock // acquisitions we have to observe (also see trycommit()). gtm_word snapshot = o_ml_mg.time.load(memory_order_acquire); if (!validate(tx)) tx->restart(RESTART_VALIDATE_READ); // Update our public snapshot time. Probably useful to decrease waiting // due to quiescence-based privatization safety. // Use release memory order to establish synchronizes-with with the // privatizers; prior data loads should happen before the privatizers // potentially modify anything. tx->shared_state.store(snapshot, memory_order_release); return snapshot; } // First pass over orecs. Load and check all orecs that cover the region. // Write to read log, extend snapshot time if necessary. static gtm_rwlog_entry* pre_load(gtm_thread *tx, const void* addr, size_t len) { // Don't obtain an iterator yet because the log might get resized. size_t log_start = tx->readlog.size(); gtm_word snapshot = tx->shared_state.load(memory_order_relaxed); gtm_word locked_by_tx = ml_mg::set_locked(tx); size_t orec = ml_mg::get_orec(addr); size_t orec_end = ml_mg::get_orec_end(addr, len); do { // We need acquire memory order here so that this load will // synchronize with the store that releases the orec in trycommit(). // In turn, this makes sure that subsequent data loads will read from // a visible sequence of side effects that starts with the most recent // store to the data right before the release of the orec. gtm_word o = o_ml_mg.orecs[orec].load(memory_order_acquire); if (likely (!ml_mg::is_more_recent_or_locked(o, snapshot))) { success: gtm_rwlog_entry *e = tx->readlog.push(); e->orec = o_ml_mg.orecs + orec; e->value = o; } else if (!ml_mg::is_locked(o)) { // We cannot read this part of the region because it has been // updated more recently than our snapshot time. If we can extend // our snapshot, then we can read. snapshot = extend(tx); goto success; } else { // If the orec is locked by us, just skip it because we can just // read from it. Otherwise, restart the transaction. if (o != locked_by_tx) tx->restart(RESTART_LOCKED_READ); } orec = o_ml_mg.get_next_orec(orec); } while (orec != orec_end); return &tx->readlog[log_start]; } // Second pass over orecs, verifying that the we had a consistent read. // Restart the transaction if any of the orecs is locked by another // transaction. static void post_load(gtm_thread *tx, gtm_rwlog_entry* log) { for (gtm_rwlog_entry *end = tx->readlog.end(); log != end; log++) { // Check that the snapshot is consistent. We expect the previous data // load to have acquire memory order, or be atomic and followed by an // acquire fence. // As a result, the data load will synchronize with the release fence // issued by the transactions whose data updates the data load has read // from. This forces the orec load to read from a visible sequence of // side effects that starts with the other updating transaction's // store that acquired the orec and set it to locked. // We therefore either read a value with the locked bit set (and // restart) or read an orec value that was written after the data had // been written. Either will allow us to detect inconsistent reads // because it will have a higher/different value. // Also note that differently to validate(), we compare the raw value // of the orec here, including incarnation numbers. We must prevent // returning uncommitted data from loads (whereas when validating, we // already performed a consistent load). gtm_word o = log->orec->load(memory_order_relaxed); if (log->value != o) tx->restart(RESTART_VALIDATE_READ); } } template <typename V> static V load(const V* addr, ls_modifier mod) { // Read-for-write should be unlikely, but we need to handle it or will // break later WaW optimizations. if (unlikely(mod == RfW)) { pre_write(addr, sizeof(V)); return *addr; } if (unlikely(mod == RaW)) return *addr; // ??? Optimize for RaR? gtm_thread *tx = gtm_thr(); gtm_rwlog_entry* log = pre_load(tx, addr, sizeof(V)); // Load the data. // This needs to have acquire memory order (see post_load()). // Alternatively, we can put an acquire fence after the data load but this // is probably less efficient. // FIXME We would need an atomic load with acquire memory order here but // we can't just forge an atomic load for nonatomic data because this // might not work on all implementations of atomics. However, we need // the acquire memory order and we can only establish this if we link // it to the matching release using a reads-from relation between atomic // loads. Also, the compiler is allowed to optimize nonatomic accesses // differently than atomic accesses (e.g., if the load would be moved to // after the fence, we potentially don't synchronize properly anymore). // Instead of the following, just use an ordinary load followed by an // acquire fence, and hope that this is good enough for now: // V v = atomic_load_explicit((atomic<V>*)addr, memory_order_acquire); V v = *addr; atomic_thread_fence(memory_order_acquire); // ??? Retry the whole load if it wasn't consistent? post_load(tx, log); return v; } template <typename V> static void store(V* addr, const V value, ls_modifier mod) { if (likely(mod != WaW)) pre_write(addr, sizeof(V)); // FIXME We would need an atomic store here but we can't just forge an // atomic load for nonatomic data because this might not work on all // implementations of atomics. However, we need this store to link the // release fence in pre_write() to the acquire operation in load, which // is only guaranteed if we have a reads-from relation between atomic // accesses. Also, the compiler is allowed to optimize nonatomic accesses // differently than atomic accesses (e.g., if the store would be moved // to before the release fence in pre_write(), things could go wrong). // atomic_store_explicit((atomic<V>*)addr, value, memory_order_relaxed); *addr = value; } public: static void memtransfer_static(void *dst, const void* src, size_t size, bool may_overlap, ls_modifier dst_mod, ls_modifier src_mod) { gtm_rwlog_entry* log = 0; gtm_thread *tx = 0; if (src_mod == RfW) { tx = gtm_thr(); pre_write(tx, src, size); } else if (src_mod != RaW && src_mod != NONTXNAL) { tx = gtm_thr(); log = pre_load(tx, src, size); } // ??? Optimize for RaR? if (dst_mod != NONTXNAL && dst_mod != WaW) { if (src_mod != RfW && (src_mod == RaW || src_mod == NONTXNAL)) tx = gtm_thr(); pre_write(tx, dst, size); } // FIXME We should use atomics here (see store()). Let's just hope that // memcpy/memmove are good enough. if (!may_overlap) ::memcpy(dst, src, size); else ::memmove(dst, src, size); // ??? Retry the whole memtransfer if it wasn't consistent? if (src_mod != RfW && src_mod != RaW && src_mod != NONTXNAL) { // See load() for why we need the acquire fence here. atomic_thread_fence(memory_order_acquire); post_load(tx, log); } } static void memset_static(void *dst, int c, size_t size, ls_modifier mod) { if (mod != WaW) pre_write(dst, size); // FIXME We should use atomics here (see store()). Let's just hope that // memset is good enough. ::memset(dst, c, size); } virtual gtm_restart_reason begin_or_restart() { // We don't need to do anything for nested transactions. gtm_thread *tx = gtm_thr(); if (tx->parent_txns.size() > 0) return NO_RESTART; // Read the current time, which becomes our snapshot time. // Use acquire memory oder so that we see the lock acquisitions by update // transcations that incremented the global time (see trycommit()). gtm_word snapshot = o_ml_mg.time.load(memory_order_acquire); // Re-initialize method group on time overflow. if (snapshot >= o_ml_mg.TIME_MAX) return RESTART_INIT_METHOD_GROUP; // We don't need to enforce any ordering for the following store. There // are no earlier data loads in this transaction, so the store cannot // become visible before those (which could lead to the violation of // privatization safety). The store can become visible after later loads // but this does not matter because the previous value will have been // smaller or equal (the serial lock will set shared_state to zero when // marking the transaction as active, and restarts enforce immediate // visibility of a smaller or equal value with a barrier (see // rollback()). tx->shared_state.store(snapshot, memory_order_relaxed); return NO_RESTART; } virtual bool trycommit(gtm_word& priv_time) { gtm_thread* tx = gtm_thr(); // If we haven't updated anything, we can commit. if (!tx->writelog.size()) { tx->readlog.clear(); return true; } // Get a commit time. // Overflow of o_ml_mg.time is prevented in begin_or_restart(). // We need acq_rel here because (1) the acquire part is required for our // own subsequent call to validate(), and the release part is necessary to // make other threads' validate() work as explained there and in extend(). gtm_word ct = o_ml_mg.time.fetch_add(1, memory_order_acq_rel) + 1; // Extend our snapshot time to at least our commit time. // Note that we do not need to validate if our snapshot time is right // before the commit time because we are never sharing the same commit // time with other transactions. // No need to reset shared_state, which will be modified by the serial // lock right after our commit anyway. gtm_word snapshot = tx->shared_state.load(memory_order_relaxed); if (snapshot < ct - 1 && !validate(tx)) return false; // Release orecs. // See pre_load() / post_load() for why we need release memory order. // ??? Can we use a release fence and relaxed stores? gtm_word v = ml_mg::set_time(ct); for (gtm_rwlog_entry *i = tx->writelog.begin(), *ie = tx->writelog.end(); i != ie; i++) i->orec->store(v, memory_order_release); // We're done, clear the logs. tx->writelog.clear(); tx->readlog.clear(); // Need to ensure privatization safety. Every other transaction must // have a snapshot time that is at least as high as our commit time // (i.e., our commit must be visible to them). priv_time = ct; return true; } virtual void rollback(gtm_transaction_cp *cp) { // We don't do anything for rollbacks of nested transactions. // ??? We could release locks here if we snapshot writelog size. readlog // is similar. This is just a performance optimization though. Nested // aborts should be rather infrequent, so the additional save/restore // overhead for the checkpoints could be higher. if (cp != 0) return; gtm_thread *tx = gtm_thr(); gtm_word overflow_value = 0; // Release orecs. for (gtm_rwlog_entry *i = tx->writelog.begin(), *ie = tx->writelog.end(); i != ie; i++) { // If possible, just increase the incarnation number. // See pre_load() / post_load() for why we need release memory order. // ??? Can we use a release fence and relaxed stores? (Same below.) if (ml_mg::has_incarnation_left(i->value)) i->orec->store(ml_mg::inc_incarnation(i->value), memory_order_release); else { // We have an incarnation overflow. Acquire a new timestamp, and // use it from now on as value for each orec whose incarnation // number cannot be increased. // Overflow of o_ml_mg.time is prevented in begin_or_restart(). // See pre_load() / post_load() for why we need release memory // order. if (!overflow_value) // Release memory order is sufficient but required here. // In contrast to the increment in trycommit(), we need release // for the same reason but do not need the acquire because we // do not validate subsequently. overflow_value = ml_mg::set_time( o_ml_mg.time.fetch_add(1, memory_order_release) + 1); i->orec->store(overflow_value, memory_order_release); } } // We need this release fence to ensure that privatizers see the // rolled-back original state (not any uncommitted values) when they read // the new snapshot time that we write in begin_or_restart(). atomic_thread_fence(memory_order_release); // We're done, clear the logs. tx->writelog.clear(); tx->readlog.clear(); } virtual bool supports(unsigned number_of_threads) { // Each txn can commit and fail and rollback once before checking for // overflow, so this bounds the number of threads that we can support. // In practice, this won't be a problem but we check it anyway so that // we never break in the occasional weird situation. return (number_of_threads * 2 <= ml_mg::OVERFLOW_RESERVE); } CREATE_DISPATCH_METHODS(virtual, ) CREATE_DISPATCH_METHODS_MEM() ml_wt_dispatch() : abi_dispatch(false, true, false, false, &o_ml_mg) { } }; } // anon namespace static const ml_wt_dispatch o_ml_wt_dispatch; abi_dispatch * GTM::dispatch_ml_wt () { return const_cast<ml_wt_dispatch *>(&o_ml_wt_dispatch); }
Go to most recent revision | Compare with Previous | Blame | View Log