glibc/nptl/sem_waitcommon.c
2023-06-02 01:39:48 +00:00

359 lines
14 KiB
C

/* sem_waitcommon -- wait on a semaphore, shared code.
Copyright (C) 2003-2023 Free Software Foundation, Inc.
This file is part of the GNU C Library.
The GNU C Library is free software; you can redistribute it and/or
modify it under the terms of the GNU Lesser General Public
License as published by the Free Software Foundation; either
version 2.1 of the License, or (at your option) any later version.
The GNU C Library 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
Lesser General Public License for more details.
You should have received a copy of the GNU Lesser General Public
License along with the GNU C Library; if not, see
<https://www.gnu.org/licenses/>. */
#include <kernel-features.h>
#include <errno.h>
#include <sysdep.h>
#include <futex-internal.h>
#include <internaltypes.h>
#include <semaphore.h>
#include <sys/time.h>
#include <pthreadP.h>
#include <shlib-compat.h>
#include <atomic.h>
/* The semaphore provides two main operations: sem_post adds a token to the
semaphore; sem_wait grabs a token from the semaphore, potentially waiting
until there is a token available. A sem_wait needs to synchronize with
the sem_post that provided the token, so that whatever lead to the sem_post
happens before the code after sem_wait.
Conceptually, available tokens can simply be counted; let's call that the
value of the semaphore. However, we also want to know whether there might
be a sem_wait that is blocked on the value because it was zero (using a
futex with the value being the futex variable); if there is no blocked
sem_wait, sem_post does not need to execute a futex_wake call. Therefore,
we also need to count the number of potentially blocked sem_wait calls
(which we call nwaiters).
What makes this tricky is that POSIX requires that a semaphore can be
destroyed as soon as the last remaining sem_wait has returned, and no
other sem_wait or sem_post calls are executing concurrently. However, the
sem_post call whose token was consumed by the last sem_wait is considered
to have finished once it provided the token to the sem_wait.
Thus, sem_post must not access the semaphore struct anymore after it has
made a token available; IOW, it needs to be able to atomically provide
a token and check whether any blocked sem_wait calls might exist.
This is straightforward to do if the architecture provides 64b atomics
because we can just put both the value and nwaiters into one variable that
we access atomically: This is the data field, the value is in the
least-significant 32 bits, and nwaiters in the other bits. When sem_post
makes a value available, it can atomically check nwaiters.
If we have only 32b atomics available, we cannot put both nwaiters and
value into one 32b value because then we might have too few bits for both
of those counters. Therefore, we need to use two distinct fields.
To allow sem_post to atomically make a token available and check for
blocked sem_wait calls, we use one bit in value to indicate whether
nwaiters is nonzero. That allows sem_post to use basically the same
algorithm as with 64b atomics, but requires sem_wait to update the bit; it
can't do this atomically with another access to nwaiters, but it can compute
a conservative value for the bit because it's benign if the bit is set
even if nwaiters is zero (all we get is an unnecessary futex wake call by
sem_post).
Specifically, sem_wait will unset the bit speculatively if it believes that
there is no other concurrently executing sem_wait. If it misspeculated,
it will have to clean up by waking any other sem_wait call (i.e., what
sem_post would do otherwise). This does not conflict with the destruction
requirement because the semaphore must not be destructed while any sem_wait
is still executing. */
#if !__HAVE_64B_ATOMICS
static void
__sem_wait_32_finish (struct new_sem *sem);
#endif
static void
__sem_wait_cleanup (void *arg)
{
struct new_sem *sem = (struct new_sem *) arg;
#if __HAVE_64B_ATOMICS
/* Stop being registered as a waiter. See below for MO. */
atomic_fetch_add_relaxed (&sem->data, -((uint64_t) 1 << SEM_NWAITERS_SHIFT));
#else
__sem_wait_32_finish (sem);
#endif
}
/* Wait until at least one token is available, possibly with a timeout.
This is in a separate function in order to make sure gcc
puts the call site into an exception region, and thus the
cleanups get properly run. TODO still necessary? Other futex_wait
users don't seem to need it. */
static int
__attribute__ ((noinline))
do_futex_wait (struct new_sem *sem, clockid_t clockid,
const struct __timespec64 *abstime)
{
int err;
#if __HAVE_64B_ATOMICS
err = __futex_abstimed_wait_cancelable64 (
(unsigned int *) &sem->data + SEM_VALUE_OFFSET, 0,
clockid, abstime,
sem->private);
#else
err = __futex_abstimed_wait_cancelable64 (&sem->value, SEM_NWAITERS_MASK,
clockid, abstime, sem->private);
#endif
return err;
}
/* Fast path: Try to grab a token without blocking. */
static int
__new_sem_wait_fast (struct new_sem *sem, int definitive_result)
{
/* We need acquire MO if we actually grab a token, so that this
synchronizes with all token providers (i.e., the RMW operation we read
from or all those before it in modification order; also see sem_post).
We do not need to guarantee any ordering if we observed that there is
no token (POSIX leaves it unspecified whether functions that fail
synchronize memory); thus, relaxed MO is sufficient for the initial load
and the failure path of the CAS. If the weak CAS fails and we need a
definitive result, retry. */
#if __HAVE_64B_ATOMICS
uint64_t d = atomic_load_relaxed (&sem->data);
do
{
if ((d & SEM_VALUE_MASK) == 0)
break;
if (atomic_compare_exchange_weak_acquire (&sem->data, &d, d - 1))
return 0;
}
while (definitive_result);
return -1;
#else
unsigned int v = atomic_load_relaxed (&sem->value);
do
{
if ((v >> SEM_VALUE_SHIFT) == 0)
break;
if (atomic_compare_exchange_weak_acquire (&sem->value,
&v, v - (1 << SEM_VALUE_SHIFT)))
return 0;
}
while (definitive_result);
return -1;
#endif
}
/* Slow path that blocks. */
static int
__attribute__ ((noinline))
__new_sem_wait_slow64 (struct new_sem *sem, clockid_t clockid,
const struct __timespec64 *abstime)
{
int err = 0;
#if __HAVE_64B_ATOMICS
/* Add a waiter. Relaxed MO is sufficient because we can rely on the
ordering provided by the RMW operations we use. */
uint64_t d = atomic_fetch_add_relaxed (&sem->data,
(uint64_t) 1 << SEM_NWAITERS_SHIFT);
pthread_cleanup_push (__sem_wait_cleanup, sem);
/* Wait for a token to be available. Retry until we can grab one. */
for (;;)
{
/* If there is no token available, sleep until there is. */
if ((d & SEM_VALUE_MASK) == 0)
{
err = do_futex_wait (sem, clockid, abstime);
/* A futex return value of 0 or EAGAIN is due to a real or spurious
wake-up, or due to a change in the number of tokens. We retry in
these cases.
If we timed out, forward this to the caller.
EINTR is returned if we are interrupted by a signal; we
forward this to the caller. (See futex_wait and related
documentation. Before Linux 2.6.22, EINTR was also returned on
spurious wake-ups; we only support more recent Linux versions,
so do not need to consider this here.) */
if (err == ETIMEDOUT || err == EINTR || err == EOVERFLOW)
{
__set_errno (err);
err = -1;
/* Stop being registered as a waiter. */
atomic_fetch_add_relaxed (&sem->data,
-((uint64_t) 1 << SEM_NWAITERS_SHIFT));
break;
}
/* Relaxed MO is sufficient; see below. */
d = atomic_load_relaxed (&sem->data);
}
else
{
/* Try to grab both a token and stop being a waiter. We need
acquire MO so this synchronizes with all token providers (i.e.,
the RMW operation we read from or all those before it in
modification order; also see sem_post). On the failure path,
relaxed MO is sufficient because we only eventually need the
up-to-date value; the futex_wait or the CAS perform the real
work. */
if (atomic_compare_exchange_weak_acquire (&sem->data,
&d, d - 1 - ((uint64_t) 1 << SEM_NWAITERS_SHIFT)))
{
err = 0;
break;
}
}
}
pthread_cleanup_pop (0);
#else
/* The main difference to the 64b-atomics implementation is that we need to
access value and nwaiters in separate steps, and that the nwaiters bit
in the value can temporarily not be set even if nwaiters is nonzero.
We work around incorrectly unsetting the nwaiters bit by letting sem_wait
set the bit again and waking the number of waiters that could grab a
token. There are two additional properties we need to ensure:
(1) We make sure that whenever unsetting the bit, we see the increment of
nwaiters by the other thread that set the bit. IOW, we will notice if
we make a mistake.
(2) When setting the nwaiters bit, we make sure that we see the unsetting
of the bit by another waiter that happened before us. This avoids having
to blindly set the bit whenever we need to block on it. We set/unset
the bit while having incremented nwaiters (i.e., are a registered
waiter), and the problematic case only happens when one waiter indeed
followed another (i.e., nwaiters was never larger than 1); thus, this
works similarly as with a critical section using nwaiters (see the MOs
and related comments below).
An alternative approach would be to unset the bit after decrementing
nwaiters; however, that would result in needing Dekker-like
synchronization and thus full memory barriers. We also would not be able
to prevent misspeculation, so this alternative scheme does not seem
beneficial. */
unsigned int v;
/* Add a waiter. We need acquire MO so this synchronizes with the release
MO we use when decrementing nwaiters below; it ensures that if another
waiter unset the bit before us, we see that and set it again. Also see
property (2) above. */
atomic_fetch_add_acquire (&sem->nwaiters, 1);
pthread_cleanup_push (__sem_wait_cleanup, sem);
/* Wait for a token to be available. Retry until we can grab one. */
/* We do not need any ordering wrt. to this load's reads-from, so relaxed
MO is sufficient. The acquire MO above ensures that in the problematic
case, we do see the unsetting of the bit by another waiter. */
v = atomic_load_relaxed (&sem->value);
do
{
do
{
/* We are about to block, so make sure that the nwaiters bit is
set. We need release MO on the CAS to ensure that when another
waiter unsets the nwaiters bit, it will also observe that we
incremented nwaiters in the meantime (also see the unsetting of
the bit below). Relaxed MO on CAS failure is sufficient (see
above). */
do
{
if ((v & SEM_NWAITERS_MASK) != 0)
break;
}
while (!atomic_compare_exchange_weak_release (&sem->value,
&v, v | SEM_NWAITERS_MASK));
/* If there is no token, wait. */
if ((v >> SEM_VALUE_SHIFT) == 0)
{
/* See __HAVE_64B_ATOMICS variant. */
err = do_futex_wait (sem, clockid, abstime);
if (err == ETIMEDOUT || err == EINTR)
{
__set_errno (err);
err = -1;
goto error;
}
err = 0;
/* We blocked, so there might be a token now. Relaxed MO is
sufficient (see above). */
v = atomic_load_relaxed (&sem->value);
}
}
/* If there is no token, we must not try to grab one. */
while ((v >> SEM_VALUE_SHIFT) == 0);
}
/* Try to grab a token. We need acquire MO so this synchronizes with
all token providers (i.e., the RMW operation we read from or all those
before it in modification order; also see sem_post). */
while (!atomic_compare_exchange_weak_acquire (&sem->value,
&v, v - (1 << SEM_VALUE_SHIFT)));
error:
pthread_cleanup_pop (0);
__sem_wait_32_finish (sem);
#endif
return err;
}
/* Stop being a registered waiter (non-64b-atomics code only). */
#if !__HAVE_64B_ATOMICS
static void
__sem_wait_32_finish (struct new_sem *sem)
{
/* The nwaiters bit is still set, try to unset it now if this seems
necessary. We do this before decrementing nwaiters so that the unsetting
is visible to other waiters entering after us. Relaxed MO is sufficient
because we are just speculating here; a stronger MO would not prevent
misspeculation. */
unsigned int wguess = atomic_load_relaxed (&sem->nwaiters);
if (wguess == 1)
/* We might be the last waiter, so unset. This needs acquire MO so that
it synchronizes with the release MO when setting the bit above; if we
overwrite someone else that set the bit, we'll read in the following
decrement of nwaiters at least from that release sequence, so we'll
see if the other waiter is still active or if another writer entered
in the meantime (i.e., using the check below). */
atomic_fetch_and_acquire (&sem->value, ~SEM_NWAITERS_MASK);
/* Now stop being a waiter, and see whether our guess was correct.
This needs release MO so that it synchronizes with the acquire MO when
a waiter increments nwaiters; this makes sure that newer writers see that
we reset the waiters_present bit. */
unsigned int wfinal = atomic_fetch_add_release (&sem->nwaiters, -1);
if (wfinal > 1 && wguess == 1)
{
/* We guessed wrong, and so need to clean up after the mistake and
unblock any waiters that could have not been woken. There is no
additional ordering that we need to set up, so relaxed MO is
sufficient. */
unsigned int v = atomic_fetch_or_relaxed (&sem->value,
SEM_NWAITERS_MASK);
/* If there are available tokens, then wake as many waiters. If there
aren't any, then there is no need to wake anyone because there is
none to grab for another waiter. If tokens become available
subsequently, then the respective sem_post calls will do the wake-up
due to us having set the nwaiters bit again. */
v >>= SEM_VALUE_SHIFT;
if (v > 0)
futex_wake (&sem->value, v, sem->private);
}
}
#endif