Provided by: manpages-posix-dev_2013a-1_all 
PROLOG
This manual page is part of the POSIX Programmer's Manual. The Linux implementation of
this interface may differ (consult the corresponding Linux manual page for details of
Linux behavior), or the interface may not be implemented on Linux.
NAME
pthread_cond_timedwait, pthread_cond_wait — wait on a condition
SYNOPSIS
#include <pthread.h>
int pthread_cond_timedwait(pthread_cond_t *restrict cond,
pthread_mutex_t *restrict mutex,
const struct timespec *restrict abstime);
int pthread_cond_wait(pthread_cond_t *restrict cond,
pthread_mutex_t *restrict mutex);
DESCRIPTION
The pthread_cond_timedwait() and pthread_cond_wait() functions shall block on a condition
variable. The application shall ensure that these functions are called with mutex locked
by the calling thread; otherwise, an error (for PTHREAD_MUTEX_ERRORCHECK and robust
mutexes) or undefined behavior (for other mutexes) results.
These functions atomically release mutex and cause the calling thread to block on the
condition variable cond; atomically here means ``atomically with respect to access by
another thread to the mutex and then the condition variable''. That is, if another thread
is able to acquire the mutex after the about-to-block thread has released it, then a
subsequent call to pthread_cond_broadcast() or pthread_cond_signal() in that thread shall
behave as if it were issued after the about-to-block thread has blocked.
Upon successful return, the mutex shall have been locked and shall be owned by the calling
thread. If mutex is a robust mutex where an owner terminated while holding the lock and
the state is recoverable, the mutex shall be acquired even though the function returns an
error code.
When using condition variables there is always a Boolean predicate involving shared
variables associated with each condition wait that is true if the thread should proceed.
Spurious wakeups from the pthread_cond_timedwait() or pthread_cond_wait() functions may
occur. Since the return from pthread_cond_timedwait() or pthread_cond_wait() does not
imply anything about the value of this predicate, the predicate should be re-evaluated
upon such return.
When a thread waits on a condition variable, having specified a particular mutex to either
the pthread_cond_timedwait() or the pthread_cond_wait() operation, a dynamic binding is
formed between that mutex and condition variable that remains in effect as long as at
least one thread is blocked on the condition variable. During this time, the effect of an
attempt by any thread to wait on that condition variable using a different mutex is
undefined. Once all waiting threads have been unblocked (as by the
pthread_cond_broadcast() operation), the next wait operation on that condition variable
shall form a new dynamic binding with the mutex specified by that wait operation. Even
though the dynamic binding between condition variable and mutex may be removed or replaced
between the time a thread is unblocked from a wait on the condition variable and the time
that it returns to the caller or begins cancellation cleanup, the unblocked thread shall
always re-acquire the mutex specified in the condition wait operation call from which it
is returning.
A condition wait (whether timed or not) is a cancellation point. When the cancelability
type of a thread is set to PTHREAD_CANCEL_DEFERRED, a side-effect of acting upon a
cancellation request while in a condition wait is that the mutex is (in effect) re-
acquired before calling the first cancellation cleanup handler. The effect is as if the
thread were unblocked, allowed to execute up to the point of returning from the call to
pthread_cond_timedwait() or pthread_cond_wait(), but at that point notices the
cancellation request and instead of returning to the caller of pthread_cond_timedwait() or
pthread_cond_wait(), starts the thread cancellation activities, which includes calling
cancellation cleanup handlers.
A thread that has been unblocked because it has been canceled while blocked in a call to
pthread_cond_timedwait() or pthread_cond_wait() shall not consume any condition signal
that may be directed concurrently at the condition variable if there are other threads
blocked on the condition variable.
The pthread_cond_timedwait() function shall be equivalent to pthread_cond_wait(), except
that an error is returned if the absolute time specified by abstime passes (that is,
system time equals or exceeds abstime) before the condition cond is signaled or
broadcasted, or if the absolute time specified by abstime has already been passed at the
time of the call. When such timeouts occur, pthread_cond_timedwait() shall nonetheless
release and re-acquire the mutex referenced by mutex, and may consume a condition signal
directed concurrently at the condition variable.
The condition variable shall have a clock attribute which specifies the clock that shall
be used to measure the time specified by the abstime argument. The
pthread_cond_timedwait() function is also a cancellation point.
If a signal is delivered to a thread waiting for a condition variable, upon return from
the signal handler the thread resumes waiting for the condition variable as if it was not
interrupted, or it shall return zero due to spurious wakeup.
The behavior is undefined if the value specified by the cond or mutex argument to these
functions does not refer to an initialized condition variable or an initialized mutex
object, respectively.
RETURN VALUE
Except in the case of [ETIMEDOUT], all these error checks shall act as if they were
performed immediately at the beginning of processing for the function and shall cause an
error return, in effect, prior to modifying the state of the mutex specified by mutex or
the condition variable specified by cond.
Upon successful completion, a value of zero shall be returned; otherwise, an error number
shall be returned to indicate the error.
ERRORS
These functions shall fail if:
ENOTRECOVERABLE
The state protected by the mutex is not recoverable.
EOWNERDEAD
The mutex is a robust mutex and the process containing the previous owning thread
terminated while holding the mutex lock. The mutex lock shall be acquired by the
calling thread and it is up to the new owner to make the state consistent.
EPERM The mutex type is PTHREAD_MUTEX_ERRORCHECK or the mutex is a robust mutex, and the
current thread does not own the mutex.
The pthread_cond_timedwait() function shall fail if:
ETIMEDOUT
The time specified by abstime to pthread_cond_timedwait() has passed.
EINVAL The abstime argument specified a nanosecond value less than zero or greater than or
equal to 1000 million.
These functions may fail if:
EOWNERDEAD
The mutex is a robust mutex and the previous owning thread terminated while holding
the mutex lock. The mutex lock shall be acquired by the calling thread and it is up
to the new owner to make the state consistent.
These functions shall not return an error code of [EINTR].
The following sections are informative.
EXAMPLES
None.
APPLICATION USAGE
Applications that have assumed that non-zero return values are errors will need updating
for use with robust mutexes, since a valid return for a thread acquiring a mutex which is
protecting a currently inconsistent state is [EOWNERDEAD]. Applications that do not check
the error returns, due to ruling out the possibility of such errors arising, should not
use robust mutexes. If an application is supposed to work with normal and robust mutexes,
it should check all return values for error conditions and if necessary take appropriate
action.
RATIONALE
If an implementation detects that the value specified by the cond argument to
pthread_cond_timedwait() or pthread_cond_wait() does not refer to an initialized condition
variable, or detects that the value specified by the mutex argument to
pthread_cond_timedwait() or pthread_cond_wait() does not refer to an initialized mutex
object, it is recommended that the function should fail and report an [EINVAL] error.
Condition Wait Semantics
It is important to note that when pthread_cond_wait() and pthread_cond_timedwait() return
without error, the associated predicate may still be false. Similarly, when
pthread_cond_timedwait() returns with the timeout error, the associated predicate may be
true due to an unavoidable race between the expiration of the timeout and the predicate
state change.
The application needs to recheck the predicate on any return because it cannot be sure
there is another thread waiting on the thread to handle the signal, and if there is not
then the signal is lost. The burden is on the application to check the predicate.
Some implementations, particularly on a multi-processor, may sometimes cause multiple
threads to wake up when the condition variable is signaled simultaneously on different
processors.
In general, whenever a condition wait returns, the thread has to re-evaluate the predicate
associated with the condition wait to determine whether it can safely proceed, should wait
again, or should declare a timeout. A return from the wait does not imply that the
associated predicate is either true or false.
It is thus recommended that a condition wait be enclosed in the equivalent of a ``while
loop'' that checks the predicate.
Timed Wait Semantics
An absolute time measure was chosen for specifying the timeout parameter for two reasons.
First, a relative time measure can be easily implemented on top of a function that
specifies absolute time, but there is a race condition associated with specifying an
absolute timeout on top of a function that specifies relative timeouts. For example,
assume that clock_gettime() returns the current time and cond_relative_timed_wait() uses
relative timeouts:
clock_gettime(CLOCK_REALTIME, &now)
reltime = sleep_til_this_absolute_time -now;
cond_relative_timed_wait(c, m, &reltime);
If the thread is preempted between the first statement and the last statement, the thread
blocks for too long. Blocking, however, is irrelevant if an absolute timeout is used. An
absolute timeout also need not be recomputed if it is used multiple times in a loop, such
as that enclosing a condition wait.
For cases when the system clock is advanced discontinuously by an operator, it is expected
that implementations process any timed wait expiring at an intervening time as if that
time had actually occurred.
Cancellation and Condition Wait
A condition wait, whether timed or not, is a cancellation point. That is, the functions
pthread_cond_wait() or pthread_cond_timedwait() are points where a pending (or concurrent)
cancellation request is noticed. The reason for this is that an indefinite wait is
possible at these points—whatever event is being waited for, even if the program is
totally correct, might never occur; for example, some input data being awaited might never
be sent. By making condition wait a cancellation point, the thread can be canceled and
perform its cancellation cleanup handler even though it may be stuck in some indefinite
wait.
A side-effect of acting on a cancellation request while a thread is blocked on a condition
variable is to re-acquire the mutex before calling any of the cancellation cleanup
handlers. This is done in order to ensure that the cancellation cleanup handler is
executed in the same state as the critical code that lies both before and after the call
to the condition wait function. This rule is also required when interfacing to POSIX
threads from languages, such as Ada or C++, which may choose to map cancellation onto a
language exception; this rule ensures that each exception handler guarding a critical
section can always safely depend upon the fact that the associated mutex has already been
locked regardless of exactly where within the critical section the exception was raised.
Without this rule, there would not be a uniform rule that exception handlers could follow
regarding the lock, and so coding would become very cumbersome.
Therefore, since some statement has to be made regarding the state of the lock when a
cancellation is delivered during a wait, a definition has been chosen that makes
application coding most convenient and error free.
When acting on a cancellation request while a thread is blocked on a condition variable,
the implementation is required to ensure that the thread does not consume any condition
signals directed at that condition variable if there are any other threads waiting on that
condition variable. This rule is specified in order to avoid deadlock conditions that
could occur if these two independent requests (one acting on a thread and the other acting
on the condition variable) were not processed independently.
Performance of Mutexes and Condition Variables
Mutexes are expected to be locked only for a few instructions. This practice is almost
automatically enforced by the desire of programmers to avoid long serial regions of
execution (which would reduce total effective parallelism).
When using mutexes and condition variables, one tries to ensure that the usual case is to
lock the mutex, access shared data, and unlock the mutex. Waiting on a condition variable
should be a relatively rare situation. For example, when implementing a read-write lock,
code that acquires a read-lock typically needs only to increment the count of readers
(under mutual-exclusion) and return. The calling thread would actually wait on the
condition variable only when there is already an active writer. So the efficiency of a
synchronization operation is bounded by the cost of mutex lock/unlock and not by condition
wait. Note that in the usual case there is no context switch.
This is not to say that the efficiency of condition waiting is unimportant. Since there
needs to be at least one context switch per Ada rendezvous, the efficiency of waiting on a
condition variable is important. The cost of waiting on a condition variable should be
little more than the minimal cost for a context switch plus the time to unlock and lock
the mutex.
Features of Mutexes and Condition Variables
It had been suggested that the mutex acquisition and release be decoupled from condition
wait. This was rejected because it is the combined nature of the operation that, in fact,
facilitates realtime implementations. Those implementations can atomically move a high-
priority thread between the condition variable and the mutex in a manner that is
transparent to the caller. This can prevent extra context switches and provide more
deterministic acquisition of a mutex when the waiting thread is signaled. Thus, fairness
and priority issues can be dealt with directly by the scheduling discipline. Furthermore,
the current condition wait operation matches existing practice.
Scheduling Behavior of Mutexes and Condition Variables
Synchronization primitives that attempt to interfere with scheduling policy by specifying
an ordering rule are considered undesirable. Threads waiting on mutexes and condition
variables are selected to proceed in an order dependent upon the scheduling policy rather
than in some fixed order (for example, FIFO or priority). Thus, the scheduling policy
determines which thread(s) are awakened and allowed to proceed.
Timed Condition Wait
The pthread_cond_timedwait() function allows an application to give up waiting for a
particular condition after a given amount of time. An example of its use follows:
(void) pthread_mutex_lock(&t.mn);
t.waiters++;
clock_gettime(CLOCK_REALTIME, &ts);
ts.tv_sec += 5;
rc = 0;
while (! mypredicate(&t) && rc == 0)
rc = pthread_cond_timedwait(&t.cond, &t.mn, &ts);
t.waiters--;
if (rc == 0 || mypredicate(&t))
setmystate(&t);
(void) pthread_mutex_unlock(&t.mn);
By making the timeout parameter absolute, it does not need to be recomputed each time the
program checks its blocking predicate. If the timeout was relative, it would have to be
recomputed before each call. This would be especially difficult since such code would
need to take into account the possibility of extra wakeups that result from extra
broadcasts or signals on the condition variable that occur before either the predicate is
true or the timeout is due.
FUTURE DIRECTIONS
None.
SEE ALSO
pthread_cond_broadcast()
The Base Definitions volume of POSIX.1‐2008, Section 4.11, Memory Synchronization,
<pthread.h>
COPYRIGHT
Portions of this text are reprinted and reproduced in electronic form from IEEE Std
1003.1, 2013 Edition, Standard for Information Technology -- Portable Operating System
Interface (POSIX), The Open Group Base Specifications Issue 7, Copyright (C) 2013 by the
Institute of Electrical and Electronics Engineers, Inc and The Open Group. (This is
POSIX.1-2008 with the 2013 Technical Corrigendum 1 applied.) In the event of any
discrepancy between this version and the original IEEE and The Open Group Standard, the
original IEEE and The Open Group Standard is the referee document. The original Standard
can be obtained online at http://www.unix.org/online.html .
Any typographical or formatting errors that appear in this page are most likely to have
been introduced during the conversion of the source files to man page format. To report
such errors, see https://www.kernel.org/doc/man-pages/reporting_bugs.html .