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Synchronization primitives in the Linux kernel. Part 2.
Queued Spinlocks
This is the second part of the chapter which describes synchronization primitives in the Linux kernel. In the first part of this chapter we meet the first spinlock. We will continue to learn about this synchronization primitive here. If you have read the previous part, you may remember that besides normal spinlocks, the Linux kernel provides a special type of spinlocks - queued spinlocks. Here we will try to understand what this concept represents.
We saw the API of spinlock in the previous part:
spin_lock_init- produces initialization of the givenspinlock;spin_lock- acquires givenspinlock;spin_lock_bh- disables software interrupts and acquire givenspinlock.spin_lock_irqsaveandspin_lock_irq- disable interrupts on local processor and preserve/not preserve previous interrupt state in theflags;spin_unlock- releases givenspinlock;spin_unlock_bh- releases givenspinlockand enables software interrupts;spin_is_locked- returns the state of the givenspinlock;- and etc.
And we know that all of these macros with the arch_* prefix which are defined in the include/linux/spinlock.h header file will be expanded to the call of the functions from the include/asm-generic/qspinlock.h:
#define arch_spin_is_locked(l) queued_spin_is_locked(l)
#define arch_spin_is_contended(l) queued_spin_is_contended(l)
#define arch_spin_value_unlocked(l) queued_spin_value_unlocked(l)
#define arch_spin_lock(l) queued_spin_lock(l)
#define arch_spin_trylock(l) queued_spin_trylock(l)
#define arch_spin_unlock(l) queued_spin_unlock(l)
Before we consider how queued spinlocks and their API are implemented, let's first take a look at the theory.
Introduction to queued spinlocks
Queued spinlocks is a locking mechanism in the Linux kernel which is replacement for the standard spinlocks. At least this is true for the x86_64 architecture. If we will look at the following kernel configuration file - kernel/Kconfig.locks, we will see following configuration entries:
config ARCH_USE_QUEUED_SPINLOCKS
bool
config QUEUED_SPINLOCKS
def_bool y if ARCH_USE_QUEUED_SPINLOCKS
depends on SMP
This means that the CONFIG_QUEUED_SPINLOCKS kernel configuration option will be enabled by default if the ARCH_USE_QUEUED_SPINLOCKS is enabled. We may see that the ARCH_USE_QUEUED_SPINLOCKS is enabled by default in the x86_64 specific kernel configuration file - arch/x86/Kconfig:
config X86
...
...
...
select ARCH_USE_QUEUED_SPINLOCKS
...
...
...
Before we start to consider what queued spinlock concept is, let's look on other types of spinlocks. For the start let's consider how a normal spinlock is implemented. Usually, the implementation of a normal spinlock is based on the test and set instruction. The principle of how this instruction works is pretty simple. It writes a value to the memory location and returns the old value from it. Together these instructions are atomic i.e. non-interruptible instructions. So if the first thread starts to execute this instruction, second thread will wait until the first processor has finished its instruction. A basic lock can be built on top of this mechanism. Schematically it may look like this:
int lock(lock)
{
while (test_and_set(lock) == 1)
;
return 0;
}
int unlock(lock)
{
lock=0;
return lock;
}
The first thread will execute the test_and_set which will set the lock to 1. When the second thread calls the lock function, it will spin in the while loop, until the first thread calls the unlock function and the lock will be equal to 0. This implementation is not very good for performance reasons, due to (at least) two problems. The first problem is that this implementation may be unfair since other threads which arrived later at the lock may acquire it first. The second problem is that all threads which want to acquire a lock must execute many atomic operations like test_and_set on a variable which is in shared memory. This leads to the cache invalidation as the cache of the processor will store lock=1, but the value of the lock in memory may not be 1 after a thread will release this lock.
The topic of this part is queued spinlocks. This approach may help to solve both of these problems. The queued spinlocks allows each processor to spin while checking its own memory location. The basic principle of a queue-based spinlock can best be understood by studying a classic queue-based spinlock implementation called the MCS lock. Before we look at implementation of the queued spinlocks in the Linux kernel, we will try to understand how MCS lock works.
The basic idea of the MCS lock is that a thread spins on a local variable and each processor in the system has its own copy of this variable (see the previous paragraph). In other words this concept is built on top of the per-cpu variables concept in the Linux kernel.
When the first thread wants to acquire a lock, it registers itself in the queue. In other words it will be added to the special queue and will acquire lock, because it is free for now. When the second thread wants to acquire the same lock before the first thread release it, this thread adds its own copy of the lock variable into this queue. In this case the first thread will contain a next field which will point to the second thread. From this moment, the second thread will wait until the first thread release its lock and notify next thread about this event. The first thread will be deleted from the queue and the second thread will be owner of a lock.
Schematically we can represent it like:
Empty queue:
+---------+
| |
| Queue |
| |
+---------+
First thread tries to acquire a lock:
+---------+ +----------------------------+
| | | |
| Queue |---->| First thread acquired lock |
| | | |
+---------+ +----------------------------+
Second thread tries to acquire a lock:
+---------+ +----------------------------------------+ +-------------------------+
| | | | | |
| Queue |---->| Second thread waits for first thread |<----| First thread holds lock |
| | | | | |
+---------+ +----------------------------------------+ +-------------------------+
Or the pseudocode:
void lock(...)
{
lock.next = NULL;
ancestor = put_lock_to_queue_and_return_ancestor(queue, lock);
// if we have ancestor, the lock is already acquired and we
// need to wait until it is released
if (ancestor)
{
lock.is_locked = 1;
ancestor.next = lock;
while (lock.is_locked == true)
;
}
// otherwise we are owner of the lock and may exit
}
void unlock(...)
{
// do we need to notify somebody or we are alone in the
// queue?
if (lock.next != NULL) {
// the while loop from the lock() function will be
// finished
lock.next.is_locked = false;
}
// So, we have no next threads in the queue to notify about
// lock releasing event. Let's just put `0` to the lock, will
// delete ourself from the queue and exit.
}
That's all we'll say about the theory of the queued spinlocks. Now let's consider how this mechanism is implemented in the Linux kernel. Unlike above pseudocode, the implementation of the queued spinlocks looks complex and tangled. But the study with attention will lead to success.
API of queued spinlocks
Now that we know a little about queued spinlocks from the theoretical side, it's time to see the implementation of this mechanism in the Linux kernel. As we saw above, the include/asm-generic/qspinlock.h header file provides a set of macros which represents the API for a spinlock acquiring, releasing, etc:
#define arch_spin_is_locked(l) queued_spin_is_locked(l)
#define arch_spin_is_contended(l) queued_spin_is_contended(l)
#define arch_spin_value_unlocked(l) queued_spin_value_unlocked(l)
#define arch_spin_lock(l) queued_spin_lock(l)
#define arch_spin_trylock(l) queued_spin_trylock(l)
#define arch_spin_unlock(l) queued_spin_unlock(l)
All of these macros expand to the call of functions from the same header file. Additionally, we saw the qspinlock structure from the include/asm-generic/qspinlock_types.h header file which represents a queued spinlock in the Linux kernel:
typedef struct qspinlock {
union {
atomic_t val;
struct {
u8 locked;
u8 pending;
};
struct {
u16 locked_pending;
u16 tail;
};
};
} arch_spinlock_t;
The val field represents the state of a given spinlock. This 4 bytes field consists from following parts:
0-7- locked byte;8- pending bit;9-15- not used;16-17- two bit index which represents entry of theper-cpuarray of theMCSlock (will see it soon);18-31- contains number of processor which indicates tail of the queue.
Before we move on to consider the API of queued spinlocks, notice the val field of the qspinlock structure has type - atomic_t which represents atomic variable aka a "one operation at a time" variable. So, all operations with this field will be atomic. For example let's look at the reading value of the val API:
static __always_inline int queued_spin_is_locked(struct qspinlock *lock)
{
return atomic_read(&lock->val);
}
Ok, now we know data structures which represents queued spinlock in the Linux kernel and now is the time to look at the implementation of the main function from the queued spinlocks API:
#define arch_spin_lock(l) queued_spin_lock(l)
Yes, this function is - queued_spin_lock. As we may understand from the function's name, it allows a thread to acquire a lock. This function is defined in the include/asm-generic/qspinlock_types.h header file and its implementation is:
static __always_inline void queued_spin_lock(struct qspinlock *lock)
{
u32 val;
val = atomic_cmpxchg_acquire(&lock->val, 0, _Q_LOCKED_VAL);
if (likely(val == 0))
return;
queued_spin_lock_slowpath(lock, val);
}
Looks pretty easy, except for the queued_spin_lock_slowpath function. We see that it takes only one parameter. In our case this parameter represents queued spinlock, which will be locked. Let's consider the situation where queue with locks is empty for now and the first thread wanted to acquire lock. As we may see the queued_spin_lock function starts from the call of the atomic_cmpxchg_acquire macro. As you may guess from its name, it executes atomic CMPXCHG instruction. Ultimately, the atomic_cmpxchg_acquire macro expands to the call of the __raw_cmpxchg macro almost like the following:
#define __raw_cmpxchg(ptr, old, new, size, lock) \
({ \
__typeof__(*(ptr)) __ret; \
__typeof__(*(ptr)) __old = (old); \
__typeof__(*(ptr)) __new = (new); \
\
volatile u32 *__ptr = (volatile u32 *)(ptr); \
asm volatile(lock "cmpxchgl %2,%1" \
: "=a" (__ret), "+m" (*__ptr) \
: "r" (__new), "0" (__old) \
: "memory"); \
\
__ret; \
})
which compares the old with the value pointed to by ptr. If they differ, it stores the new in the memory location which is pointed by the ptr and returns the initial value in this memory location.
Let's back to the queued_spin_lock function. Assuming that we are the first one who tried to acquire the lock, the val will be zero and we will return from the queued_spin_lock function:
val = atomic_cmpxchg_acquire(&lock-val, 0, _Q_LOCKED_VAL);
if (likely(val == 0))
return;
So far, we've only considered uncontended case (i.e. fast-path). Now let's consider contended case (i.e. slow-path). Suppose that one thread tried to acquire a lock, but the lock is already held, then queued_spin_lock_slowpath will be called. The queued_spin_lock_slowpath function is defined in the kernel/locking/qspinlock.c source code file:
void queued_spin_lock_slowpath(struct qspinlock *lock, u32 val)
{
...
...
...
if (val == _Q_PENDING_VAL) {
int cnt = _Q_PENDING_LOOPS;
val = atomic_cond_read_relaxed(&lock-val,
(VAL != _Q_PENDING_VAL) || !cnt--);
}
...
...
...
}
which waits for in-progress lock acquisition to be done with a bounded number of spins so that we guarantee forward progress. Above, we saw that the lock contains - pending bit. This bit represents thread which wanted to acquire lock, but it is already acquired by the other thread and queue is empty at the same time. In this case, the pending bit will be set and the queue will not be touched. This is done for optimization, because there are no need in unnecessary latency which will be caused by the cache invalidation in a touching of own mcs_spinlock array.
If we observe contention, then we have no choice other than queueing, so jump to queue label that we'll see later:
if (val & ~_Q_LOCKED_MASK)
goto queue;
So, the lock is already held. That is, we set the pending bit of the lock:
val = queued_fetch_set_pending_acquire(lock);
Again if we observe contention, undo the pending and queue.
if (unlikely(val & ~_Q_LOCKED_MASK)) {
if (!(val & _Q_PENDING_MASK))
clear_pending(lock);
goto queue;
}
Now, we're pending, wait for the lock owner to release it.
if (val & _Q_LOCKED_MASK)
atomic_cond_read_acquire(&)
We are allowed to take the lock. So, we clear the pending bit and set the locked bit. Now we have nothing to do with the queued_spin_lock_slowpath function, return from it.
clear_pending_set_locked(lock);
return;
Before diving into queueing, we'll see about MCS lock mechanism first. As we already know, each processor in the system has own copy of the lock. The lock is represented by the following structure:
struct mcs_spinlock {
struct mcs_spinlock *next;
int locked;
int count;
};
from the kernel/locking/mcs_spinlock.h header file. The first field represents a pointer to the next thread in the queue. The second field represents the state of the current thread in the queue, where 1 is lock already acquired and 0 in other way. And the last field of the mcs_spinlock structure represents nested locks. To understand what nested lock is, imagine situation when a thread acquired lock, but was interrupted by the hardware interrupt and an interrupt handler tries to take a lock too. For this case, each processor has not just copy of the mcs_spinlock structure but array of these structures:
static DEFINE_PER_CPU_ALIGNED(struct qnode, qnodes[MAX_NODES]);
This array allows to make four attempts of a lock acquisition for the four events in following contexts:
- normal task context;
- hardware interrupt context;
- software interrupt context;
- non-maskable interrupt context.
Notice that we did not touch queue yet. We no need in it, because for two threads it just leads to unnecessary latency for memory access. In other case, the first thread may release it lock before this moment. In this case the lock->val will contain _Q_LOCKED_VAL | _Q_PENDING_VAL and we will start to build queue. We start to build queue by the getting the local copy of the qnodes array of the processor which executes thread and calculate tail which will indicate the tail of the queue and idx which represents an index of the qnodes array:
queue:
node = this_cpu_ptr(&qnodes[0].mcs);
idx = node->count++;
tail = encode_tail(smp_processer_id(), idx);
node = grab_mcs_node(node, idx);
After this, we set locked to zero because this thread didn't acquire lock yet and next to NULL because we don't know anything about other queue entries:
node->locked = 0;
node->next = NULL;
We already touched per-cpu copy of the queue for the processor which executes current thread which wants to acquire lock, this means that owner of the lock may released it before this moment. So we may try to acquire lock again by the call of the queued_spin_trylock function:
if (queued_spin_trylock(lock))
goto release;
It does the almost same thing queued_spin_lock function does.
If the lock was successfully acquired we jump to the release label to release a node of the queue:
release:
__this_cpu_dec(qnodes[0].mcs.count);
because we no need in it anymore as lock is acquired. If the queued_spin_trylock was unsuccessful, we update tail of the queue:
old = xchg_tail(lock, tail);
next = NULL;
and retrieve previous tail. The next step is to check that queue is not empty. In this case we need to link previous entry with the new. While waitaing for the MCS lock, the next pointer may have been set by another lock waiter. We optimistically load the next pointer & prefetch the cacheline for writing to reduce latency in the upcoming MCS unlock operation:
if (old & _Q_TAIL_MASK) {
prev = decode_tail(old);
WRITE_ONCE(prev->next, node);
arch_mcs_spin_lock_contended(&node->locked);
next = READ_ONCE(node->next);
if (next)
prefetchw(next);
}
If the new node was added, we prefetch cache line from memory pointed by the next queue entry with the PREFETCHW instruction. We preload this pointer now for optimization purpose. We just became a head of queue and this means that there is upcoming MCS unlock operation and the next entry will be touched.
Yes, from this moment we are in the head of the queue. But before we are able to acquire a lock, we need to wait at least two events: current owner of a lock will release it and the second thread with pending bit will acquire a lock too:
val = atomic_cond_read_acquire(&lock->val, !(VAL & _Q_LOCKED_PENDING_MASK));
After both threads will release a lock, the head of the queue will hold a lock. In the end we just need to update the tail of the queue and remove current head from it.
That's all.
Conclusion
This is the end of the second part of the synchronization primitives chapter in the Linux kernel. In the previous part we already met the first synchronization primitive spinlock provided by the Linux kernel which is implemented as ticket spinlock. In this part we saw another implementation of the spinlock mechanism - queued spinlock. In the next part we will continue to dive into synchronization primitives in the Linux kernel.
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