/*

 * 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.  Oracle designates this

 * particular file as subject to the "Classpath" exception as provided

 * by Oracle in the LICENSE file that accompanied this code.

 *

 * 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.

 */

/*

 * This file is available under and governed by the GNU General Public

 * License version 2 only, as published by the Free Software Foundation.

 * However, the following notice accompanied the original version of this

 * file:

 *

 * Written by Doug Lea with assistance from members of JCP JSR-166

 * Expert Group and released to the public domain, as explained at

 * http://creativecommons.org/licenses/publicdomain

 */

package java.util.concurrent.locks;

import java.util.*;

import java.util.concurrent.*;

import java.util.concurrent.atomic.*;

import sun.misc.Unsafe;

/**

 * Provides a framework for implementing blocking locks and related

 * synchronizers (semaphores, events, etc) that rely on

 * first-in-first-out (FIFO) wait queues.  This class is designed to

 * be a useful basis for most kinds of synchronizers that rely on a

 * single atomic <tt>int</tt> value to represent state. Subclasses

 * must define the protected methods that change this state, and which

 * define what that state means in terms of this object being acquired

 * or released.  Given these, the other methods in this class carry

 * out all queuing and blocking mechanics. Subclasses can maintain

 * other state fields, but only the atomically updated <tt>int</tt>

 * value manipulated using methods {@link #getState}, {@link

 * #setState} and {@link #compareAndSetState} is tracked with respect

 * to synchronization.

 *

 * <p>Subclasses should be defined as non-public internal helper

 * classes that are used to implement the synchronization properties

 * of their enclosing class.  Class

 * <tt>AbstractQueuedSynchronizer</tt> does not implement any

 * synchronization interface.  Instead it defines methods such as

 * {@link #acquireInterruptibly} that can be invoked as

 * appropriate by concrete locks and related synchronizers to

 * implement their public methods.

 *

 * <p>This class supports either or both a default <em>exclusive</em>

 * mode and a <em>shared</em> mode. When acquired in exclusive mode,

 * attempted acquires by other threads cannot succeed. Shared mode

 * acquires by multiple threads may (but need not) succeed. This class

 * does not "understand" these differences except in the

 * mechanical sense that when a shared mode acquire succeeds, the next

 * waiting thread (if one exists) must also determine whether it can

 * acquire as well. Threads waiting in the different modes share the

 * same FIFO queue. Usually, implementation subclasses support only

 * one of these modes, but both can come into play for example in a

 * {@link ReadWriteLock}. Subclasses that support only exclusive or

 * only shared modes need not define the methods supporting the unused mode.

 *

 * <p>This class defines a nested {@link ConditionObject} class that

 * can be used as a {@link Condition} implementation by subclasses

 * supporting exclusive mode for which method {@link

 * #isHeldExclusively} reports whether synchronization is exclusively

 * held with respect to the current thread, method {@link #release}

 * invoked with the current {@link #getState} value fully releases

 * this object, and {@link #acquire}, given this saved state value,

 * eventually restores this object to its previous acquired state.  No

 * <tt>AbstractQueuedSynchronizer</tt> method otherwise creates such a

 * condition, so if this constraint cannot be met, do not use it.  The

 * behavior of {@link ConditionObject} depends of course on the

 * semantics of its synchronizer implementation.

 *

 * <p>This class provides inspection, instrumentation, and monitoring

 * methods for the internal queue, as well as similar methods for

 * condition objects. These can be exported as desired into classes

 * using an <tt>AbstractQueuedSynchronizer</tt> for their

 * synchronization mechanics.

 *

 * <p>Serialization of this class stores only the underlying atomic

 * integer maintaining state, so deserialized objects have empty

 * thread queues. Typical subclasses requiring serializability will

 * define a <tt>readObject</tt> method that restores this to a known

 * initial state upon deserialization.

 *

 * <h3>Usage</h3>

 *

 * <p>To use this class as the basis of a synchronizer, redefine the

 * following methods, as applicable, by inspecting and/or modifying

 * the synchronization state using {@link #getState}, {@link

 * #setState} and/or {@link #compareAndSetState}:

 *

 * <ul>

 * <li> {@link #tryAcquire}

 * <li> {@link #tryRelease}

 * <li> {@link #tryAcquireShared}

 * <li> {@link #tryReleaseShared}

 * <li> {@link #isHeldExclusively}

 *</ul>

 *

 * Each of these methods by default throws {@link

 * UnsupportedOperationException}.  Implementations of these methods

 * must be internally thread-safe, and should in general be short and

 * not block. Defining these methods is the <em>only</em> supported

 * means of using this class. All other methods are declared

 * <tt>final</tt> because they cannot be independently varied.

 *

 * <p>You may also find the inherited methods from {@link

 * AbstractOwnableSynchronizer} useful to keep track of the thread

 * owning an exclusive synchronizer.  You are encouraged to use them

 * -- this enables monitoring and diagnostic tools to assist users in

 * determining which threads hold locks.

 *

 * <p>Even though this class is based on an internal FIFO queue, it

 * does not automatically enforce FIFO acquisition policies.  The core

 * of exclusive synchronization takes the form:

 *

 * <pre>

 * Acquire:

 *     while (!tryAcquire(arg)) {

 *        <em>enqueue thread if it is not already queued</em>;

 *        <em>possibly block current thread</em>;

 *     }

 *

 * Release:

 *     if (tryRelease(arg))

 *        <em>unblock the first queued thread</em>;

 * </pre>

 *

 * (Shared mode is similar but may involve cascading signals.)

 *

 * <p><a name="barging">Because checks in acquire are invoked before

 * enqueuing, a newly acquiring thread may <em>barge</em> ahead of

 * others that are blocked and queued.  However, you can, if desired,

 * define <tt>tryAcquire</tt> and/or <tt>tryAcquireShared</tt> to

 * disable barging by internally invoking one or more of the inspection

 * methods, thereby providing a <em>fair</em> FIFO acquisition order.

 * In particular, most fair synchronizers can define <tt>tryAcquire</tt>

 * to return <tt>false</tt> if {@link #hasQueuedPredecessors} (a method

 * specifically designed to be used by fair synchronizers) returns

 * <tt>true</tt>.  Other variations are possible.

 *

 * <p>Throughput and scalability are generally highest for the

 * default barging (also known as <em>greedy</em>,

 * <em>renouncement</em>, and <em>convoy-avoidance</em>) strategy.

 * While this is not guaranteed to be fair or starvation-free, earlier

 * queued threads are allowed to recontend before later queued

 * threads, and each recontention has an unbiased chance to succeed

 * against incoming threads.  Also, while acquires do not

 * "spin" in the usual sense, they may perform multiple

 * invocations of <tt>tryAcquire</tt> interspersed with other

 * computations before blocking.  This gives most of the benefits of

 * spins when exclusive synchronization is only briefly held, without

 * most of the liabilities when it isn't. If so desired, you can

 * augment this by preceding calls to acquire methods with

 * "fast-path" checks, possibly prechecking {@link #hasContended}

 * and/or {@link #hasQueuedThreads} to only do so if the synchronizer

 * is likely not to be contended.

 *

 * <p>This class provides an efficient and scalable basis for

 * synchronization in part by specializing its range of use to

 * synchronizers that can rely on <tt>int</tt> state, acquire, and

 * release parameters, and an internal FIFO wait queue. When this does

 * not suffice, you can build synchronizers from a lower level using

 * {@link java.util.concurrent.atomic atomic} classes, your own custom

 * {@link java.util.Queue} classes, and {@link LockSupport} blocking

 * support.

 *

 * <h3>Usage Examples</h3>

 *

 * <p>Here is a non-reentrant mutual exclusion lock class that uses

 * the value zero to represent the unlocked state, and one to

 * represent the locked state. While a non-reentrant lock

 * does not strictly require recording of the current owner

 * thread, this class does so anyway to make usage easier to monitor.

 * It also supports conditions and exposes

 * one of the instrumentation methods:

 *

 * <pre>

 * class Mutex implements Lock, java.io.Serializable {

 *

 *   // Our internal helper class

 *   private static class Sync extends AbstractQueuedSynchronizer {

 *     // Report whether in locked state

 *     protected boolean isHeldExclusively() {

 *       return getState() == 1;

 *     }

 *

 *     // Acquire the lock if state is zero

 *     public boolean tryAcquire(int acquires) {

 *       assert acquires == 1; // Otherwise unused

 *       if (compareAndSetState(0, 1)) {

 *         setExclusiveOwnerThread(Thread.currentThread());

 *         return true;

 *       }

 *       return false;

 *     }

 *

 *     // Release the lock by setting state to zero

 *     protected boolean tryRelease(int releases) {

 *       assert releases == 1; // Otherwise unused

 *       if (getState() == 0) throw new IllegalMonitorStateException();

 *       setExclusiveOwnerThread(null);

 *       setState(0);

 *       return true;

 *     }

 *

 *     // Provide a Condition

 *     Condition newCondition() { return new ConditionObject(); }

 *

 *     // Deserialize properly

 *     private void readObject(ObjectInputStream s)

 *         throws IOException, ClassNotFoundException {

 *       s.defaultReadObject();

 *       setState(0); // reset to unlocked state

 *     }

 *   }

 *

 *   // The sync object does all the hard work. We just forward to it.

 *   private final Sync sync = new Sync();

 *

 *   public void lock()                { sync.acquire(1); }

 *   public boolean tryLock()          { return sync.tryAcquire(1); }

 *   public void unlock()              { sync.release(1); }

 *   public Condition newCondition()   { return sync.newCondition(); }

 *   public boolean isLocked()         { return sync.isHeldExclusively(); }

 *   public boolean hasQueuedThreads() { return sync.hasQueuedThreads(); }

 *   public void lockInterruptibly() throws InterruptedException {

 *     sync.acquireInterruptibly(1);

 *   }

 *   public boolean tryLock(long timeout, TimeUnit unit)

 *       throws InterruptedException {

 *     return sync.tryAcquireNanos(1, unit.toNanos(timeout));

 *   }

 * }

 * </pre>

 *

 * <p>Here is a latch class that is like a {@link CountDownLatch}

 * except that it only requires a single <tt>signal</tt> to

 * fire. Because a latch is non-exclusive, it uses the <tt>shared</tt>

 * acquire and release methods.

 *

 * <pre>

 * class BooleanLatch {

 *

 *   private static class Sync extends AbstractQueuedSynchronizer {

 *     boolean isSignalled() { return getState() != 0; }

 *

 *     protected int tryAcquireShared(int ignore) {

 *       return isSignalled()? 1 : -1;

 *     }

 *

 *     protected boolean tryReleaseShared(int ignore) {

 *       setState(1);

 *       return true;

 *     }

 *   }

 *

 *   private final Sync sync = new Sync();

 *   public boolean isSignalled() { return sync.isSignalled(); }

 *   public void signal()         { sync.releaseShared(1); }

 *   public void await() throws InterruptedException {

 *     sync.acquireSharedInterruptibly(1);

 *   }

 * }

 * </pre>

 *

 * @since 1.5

 * @author Doug Lea

 */

public abstract class AbstractQueuedSynchronizer

    extends AbstractOwnableSynchronizer

    implements java.io.Serializable {

    private static final long serialVersionUID = 7373984972572414691L;

    /**

     * Creates a new <tt>AbstractQueuedSynchronizer</tt> instance

     * with initial synchronization state of zero.

     */

    protected AbstractQueuedSynchronizer() { }

    /**

     * Wait queue node class.

     *

     * <p>The wait queue is a variant of a "CLH" (Craig, Landin, and

     * Hagersten) lock queue. CLH locks are normally used for

     * spinlocks.  We instead use them for blocking synchronizers, but

     * use the same basic tactic of holding some of the control

     * information about a thread in the predecessor of its node.  A

     * "status" field in each node keeps track of whether a thread

     * should block.  A node is signalled when its predecessor

     * releases.  Each node of the queue otherwise serves as a

     * specific-notification-style monitor holding a single waiting

     * thread. The status field does NOT control whether threads are

     * granted locks etc though.  A thread may try to acquire if it is

     * first in the queue. But being first does not guarantee success;

     * it only gives the right to contend.  So the currently released

     * contender thread may need to rewait.

     *

     * <p>To enqueue into a CLH lock, you atomically splice it in as new

     * tail. To dequeue, you just set the head field.

     * <pre>

     *      +------+  prev +-----+       +-----+

     * head |      | <---- |     | <---- |     |  tail

     *      +------+       +-----+       +-----+

     * </pre>

     *

     * <p>Insertion into a CLH queue requires only a single atomic

     * operation on "tail", so there is a simple atomic point of

     * demarcation from unqueued to queued. Similarly, dequeing

     * involves only updating the "head". However, it takes a bit

     * more work for nodes to determine who their successors are,

     * in part to deal with possible cancellation due to timeouts

     * and interrupts.

     *

     * <p>The "prev" links (not used in original CLH locks), are mainly

     * needed to handle cancellation. If a node is cancelled, its

     * successor is (normally) relinked to a non-cancelled

     * predecessor. For explanation of similar mechanics in the case

     * of spin locks, see the papers by Scott and Scherer at

     * http://www.cs.rochester.edu/u/scott/synchronization/

     *

     * <p>We also use "next" links to implement blocking mechanics.

     * The thread id for each node is kept in its own node, so a

     * predecessor signals the next node to wake up by traversing

     * next link to determine which thread it is.  Determination of

     * successor must avoid races with newly queued nodes to set

     * the "next" fields of their predecessors.  This is solved

     * when necessary by checking backwards from the atomically

     * updated "tail" when a node's successor appears to be null.

     * (Or, said differently, the next-links are an optimization

     * so that we don't usually need a backward scan.)

     *

     * <p>Cancellation introduces some conservatism to the basic

     * algorithms.  Since we must poll for cancellation of other

     * nodes, we can miss noticing whether a cancelled node is

     * ahead or behind us. This is dealt with by always unparking

     * successors upon cancellation, allowing them to stabilize on

     * a new predecessor, unless we can identify an uncancelled

     * predecessor who will carry this responsibility.

     *

     * <p>CLH queues need a dummy header node to get started. But

     * we don't create them on construction, because it would be wasted

     * effort if there is never contention. Instead, the node

     * is constructed and head and tail pointers are set upon first

     * contention.

     *

     * <p>Threads waiting on Conditions use the same nodes, but

     * use an additional link. Conditions only need to link nodes

     * in simple (non-concurrent) linked queues because they are

     * only accessed when exclusively held.  Upon await, a node is

     * inserted into a condition queue.  Upon signal, the node is

     * transferred to the main queue.  A special value of status

     * field is used to mark which queue a node is on.

     *

     * <p>Thanks go to Dave Dice, Mark Moir, Victor Luchangco, Bill

     * Scherer and Michael Scott, along with members of JSR-166

     * expert group, for helpful ideas, discussions, and critiques

     * on the design of this class.

     */

    static final class Node {

        /** Marker to indicate a node is waiting in shared mode */

        static final Node SHARED = new Node();

        /** Marker to indicate a node is waiting in exclusive mode */

        static final Node EXCLUSIVE = null;

        /** waitStatus value to indicate thread has cancelled */

        static final int CANCELLED =  1;

        /** waitStatus value to indicate successor's thread needs unparking */

        static final int SIGNAL    = -1;

        /** waitStatus value to indicate thread is waiting on condition */

        static final int CONDITION = -2;

        /**

         * waitStatus value to indicate the next acquireShared should

         * unconditionally propagate

         */

        static final int PROPAGATE = -3;

        /**

         * Status field, taking on only the values:

         *   SIGNAL:     The successor of this node is (or will soon be)

         *               blocked (via park), so the current node must

         *               unpark its successor when it releases or

         *               cancels. To avoid races, acquire methods must

         *               first indicate they need a signal,

         *               then retry the atomic acquire, and then,

         *               on failure, block.

         *   CANCELLED:  This node is cancelled due to timeout or interrupt.

         *               Nodes never leave this state. In particular,

         *               a thread with cancelled node never again blocks.

         *   CONDITION:  This node is currently on a condition queue.

         *               It will not be used as a sync queue node

         *               until transferred, at which time the status

         *               will be set to 0. (Use of this value here has

         *               nothing to do with the other uses of the

         *               field, but simplifies mechanics.)

         *   PROPAGATE:  A releaseShared should be propagated to other

         *               nodes. This is set (for head node only) in

         *               doReleaseShared to ensure propagation

         *               continues, even if other operations have

         *               since intervened.

         *   0:          None of the above

         *

         * The values are arranged numerically to simplify use.

         * Non-negative values mean that a node doesn't need to

         * signal. So, most code doesn't need to check for particular

         * values, just for sign.

         *

         * The field is initialized to 0 for normal sync nodes, and

         * CONDITION for condition nodes.  It is modified using CAS

         * (or when possible, unconditional volatile writes).

         */

        volatile int waitStatus;

        /**

         * Link to predecessor node that current node/thread relies on

         * for checking waitStatus. Assigned during enqueing, and nulled

         * out (for sake of GC) only upon dequeuing.  Also, upon

         * cancellation of a predecessor, we short-circuit while

         * finding a non-cancelled one, which will always exist

         * because the head node is never cancelled: A node becomes

         * head only as a result of successful acquire. A

         * cancelled thread never succeeds in acquiring, and a thread only

         * cancels itself, not any other node.

         */

        volatile Node prev;

        /**

         * Link to the successor node that the current node/thread

         * unparks upon release. Assigned during enqueuing, adjusted

         * when bypassing cancelled predecessors, and nulled out (for

         * sake of GC) when dequeued.  The enq operation does not

         * assign next field of a predecessor until after attachment,

         * so seeing a null next field does not necessarily mean that

         * node is at end of queue. However, if a next field appears

         * to be null, we can scan prev's from the tail to

         * double-check.  The next field of cancelled nodes is set to

         * point to the node itself instead of null, to make life

         * easier for isOnSyncQueue.

         */

        volatile Node next;

        /**

         * The thread that enqueued this node.  Initialized on

         * construction and nulled out after use.

         */

        volatile Thread thread;

        /**

         * Link to next node waiting on condition, or the special

         * value SHARED.  Because condition queues are accessed only

         * when holding in exclusive mode, we just need a simple

         * linked queue to hold nodes while they are waiting on

         * conditions. They are then transferred to the queue to

         * re-acquire. And because conditions can only be exclusive,

         * we save a field by using special value to indicate shared

         * mode.

         */

        Node nextWaiter;

        /**

         * Returns true if node is waiting in shared mode

         */

        final boolean isShared() {

            return nextWaiter == SHARED;

        }

        /**

         * Returns previous node, or throws NullPointerException if null.

         * Use when predecessor cannot be null.  The null check could

         * be elided, but is present to help the VM.

         *

         * @return the predecessor of this node

         */

        final Node predecessor() throws NullPointerException {

            Node p = prev;

            if (p == null)

                throw new NullPointerException();

            else

                return p;

        }

        Node() {    // Used to establish initial head or SHARED marker

        }

        Node(Thread thread, Node mode) {     // Used by addWaiter

            this.nextWaiter = mode;

            this.thread = thread;

        }

        Node(Thread thread, int waitStatus) { // Used by Condition

            this.waitStatus = waitStatus;

            this.thread = thread;

        }

    }

    /**

     * Head of the wait queue, lazily initialized.  Except for

     * initialization, it is modified only via method setHead.  Note:

     * If head exists, its waitStatus is guaranteed not to be

     * CANCELLED.

     */

    private transient volatile Node head;

    /**

     * Tail of the wait queue, lazily initialized.  Modified only via

     * method enq to add new wait node.