1 /*
   2  * DO NOT ALTER OR REMOVE COPYRIGHT NOTICES OR THIS FILE HEADER.
   3  *
   4  * This code is free software; you can redistribute it and/or modify it
   5  * under the terms of the GNU General Public License version 2 only, as
   6  * published by the Free Software Foundation.  Oracle designates this
   7  * particular file as subject to the "Classpath" exception as provided
   8  * by Oracle in the LICENSE file that accompanied this code.
   9  *
  10  * This code is distributed in the hope that it will be useful, but WITHOUT
  11  * ANY WARRANTY; without even the implied warranty of MERCHANTABILITY or
  12  * FITNESS FOR A PARTICULAR PURPOSE.  See the GNU General Public License
  13  * version 2 for more details (a copy is included in the LICENSE file that
  14  * accompanied this code).
  15  *
  16  * You should have received a copy of the GNU General Public License version
  17  * 2 along with this work; if not, write to the Free Software Foundation,
  18  * Inc., 51 Franklin St, Fifth Floor, Boston, MA 02110-1301 USA.
  19  *
  20  * Please contact Oracle, 500 Oracle Parkway, Redwood Shores, CA 94065 USA
  21  * or visit www.oracle.com if you need additional information or have any
  22  * questions.
  23  */
  24 
  25 /*
  26  * This file is available under and governed by the GNU General Public
  27  * License version 2 only, as published by the Free Software Foundation.
  28  * However, the following notice accompanied the original version of this
  29  * file:
  30  *
  31  * Written by Doug Lea with assistance from members of JCP JSR-166
  32  * Expert Group and released to the public domain, as explained at
  33  * http://creativecommons.org/licenses/publicdomain
  34  */
  35 
  36 package java.util.concurrent;
  37 
  38 import java.util.AbstractQueue;
  39 import java.util.Collection;
  40 import java.util.ConcurrentModificationException;
  41 import java.util.Iterator;
  42 import java.util.NoSuchElementException;
  43 import java.util.Queue;
  44 import java.util.concurrent.locks.LockSupport;
  45 
  46 /**
  47  * An unbounded {@link TransferQueue} based on linked nodes.
  48  * This queue orders elements FIFO (first-in-first-out) with respect
  49  * to any given producer.  The <em>head</em> of the queue is that
  50  * element that has been on the queue the longest time for some
  51  * producer.  The <em>tail</em> of the queue is that element that has
  52  * been on the queue the shortest time for some producer.
  53  *
  54  * <p>Beware that, unlike in most collections, the {@code size}
  55  * method is <em>NOT</em> a constant-time operation. Because of the
  56  * asynchronous nature of these queues, determining the current number
  57  * of elements requires a traversal of the elements.
  58  *
  59  * <p>This class and its iterator implement all of the
  60  * <em>optional</em> methods of the {@link Collection} and {@link
  61  * Iterator} interfaces.
  62  *
  63  * <p>Memory consistency effects: As with other concurrent
  64  * collections, actions in a thread prior to placing an object into a
  65  * {@code LinkedTransferQueue}
  66  * <a href="package-summary.html#MemoryVisibility"><i>happen-before</i></a>
  67  * actions subsequent to the access or removal of that element from
  68  * the {@code LinkedTransferQueue} in another thread.
  69  *
  70  * <p>This class is a member of the
  71  * <a href="{@docRoot}/../technotes/guides/collections/index.html">
  72  * Java Collections Framework</a>.
  73  *
  74  * @since 1.7
  75  * @author Doug Lea
  76  * @param <E> the type of elements held in this collection
  77  */
  78 public class LinkedTransferQueue<E> extends AbstractQueue<E>
  79     implements TransferQueue<E>, java.io.Serializable {
  80     private static final long serialVersionUID = -3223113410248163686L;
  81 
  82     /*
  83      * *** Overview of Dual Queues with Slack ***
  84      *
  85      * Dual Queues, introduced by Scherer and Scott
  86      * (http://www.cs.rice.edu/~wns1/papers/2004-DISC-DDS.pdf) are
  87      * (linked) queues in which nodes may represent either data or
  88      * requests.  When a thread tries to enqueue a data node, but
  89      * encounters a request node, it instead "matches" and removes it;
  90      * and vice versa for enqueuing requests. Blocking Dual Queues
  91      * arrange that threads enqueuing unmatched requests block until
  92      * other threads provide the match. Dual Synchronous Queues (see
  93      * Scherer, Lea, & Scott
  94      * http://www.cs.rochester.edu/u/scott/papers/2009_Scherer_CACM_SSQ.pdf)
  95      * additionally arrange that threads enqueuing unmatched data also
  96      * block.  Dual Transfer Queues support all of these modes, as
  97      * dictated by callers.
  98      *
  99      * A FIFO dual queue may be implemented using a variation of the
 100      * Michael & Scott (M&S) lock-free queue algorithm
 101      * (http://www.cs.rochester.edu/u/scott/papers/1996_PODC_queues.pdf).
 102      * It maintains two pointer fields, "head", pointing to a
 103      * (matched) node that in turn points to the first actual
 104      * (unmatched) queue node (or null if empty); and "tail" that
 105      * points to the last node on the queue (or again null if
 106      * empty). For example, here is a possible queue with four data
 107      * elements:
 108      *
 109      *  head                tail
 110      *    |                   |
 111      *    v                   v
 112      *    M -> U -> U -> U -> U
 113      *
 114      * The M&S queue algorithm is known to be prone to scalability and
 115      * overhead limitations when maintaining (via CAS) these head and
 116      * tail pointers. This has led to the development of
 117      * contention-reducing variants such as elimination arrays (see
 118      * Moir et al http://portal.acm.org/citation.cfm?id=1074013) and
 119      * optimistic back pointers (see Ladan-Mozes & Shavit
 120      * http://people.csail.mit.edu/edya/publications/OptimisticFIFOQueue-journal.pdf).
 121      * However, the nature of dual queues enables a simpler tactic for
 122      * improving M&S-style implementations when dual-ness is needed.
 123      *
 124      * In a dual queue, each node must atomically maintain its match
 125      * status. While there are other possible variants, we implement
 126      * this here as: for a data-mode node, matching entails CASing an
 127      * "item" field from a non-null data value to null upon match, and
 128      * vice-versa for request nodes, CASing from null to a data
 129      * value. (Note that the linearization properties of this style of
 130      * queue are easy to verify -- elements are made available by
 131      * linking, and unavailable by matching.) Compared to plain M&S
 132      * queues, this property of dual queues requires one additional
 133      * successful atomic operation per enq/deq pair. But it also
 134      * enables lower cost variants of queue maintenance mechanics. (A
 135      * variation of this idea applies even for non-dual queues that
 136      * support deletion of interior elements, such as
 137      * j.u.c.ConcurrentLinkedQueue.)
 138      *
 139      * Once a node is matched, its match status can never again
 140      * change.  We may thus arrange that the linked list of them
 141      * contain a prefix of zero or more matched nodes, followed by a
 142      * suffix of zero or more unmatched nodes. (Note that we allow
 143      * both the prefix and suffix to be zero length, which in turn
 144      * means that we do not use a dummy header.)  If we were not
 145      * concerned with either time or space efficiency, we could
 146      * correctly perform enqueue and dequeue operations by traversing
 147      * from a pointer to the initial node; CASing the item of the
 148      * first unmatched node on match and CASing the next field of the
 149      * trailing node on appends. (Plus some special-casing when
 150      * initially empty).  While this would be a terrible idea in
 151      * itself, it does have the benefit of not requiring ANY atomic
 152      * updates on head/tail fields.
 153      *
 154      * We introduce here an approach that lies between the extremes of
 155      * never versus always updating queue (head and tail) pointers.
 156      * This offers a tradeoff between sometimes requiring extra
 157      * traversal steps to locate the first and/or last unmatched
 158      * nodes, versus the reduced overhead and contention of fewer
 159      * updates to queue pointers. For example, a possible snapshot of
 160      * a queue is:
 161      *
 162      *  head           tail
 163      *    |              |
 164      *    v              v
 165      *    M -> M -> U -> U -> U -> U
 166      *
 167      * The best value for this "slack" (the targeted maximum distance
 168      * between the value of "head" and the first unmatched node, and
 169      * similarly for "tail") is an empirical matter. We have found
 170      * that using very small constants in the range of 1-3 work best
 171      * over a range of platforms. Larger values introduce increasing
 172      * costs of cache misses and risks of long traversal chains, while
 173      * smaller values increase CAS contention and overhead.
 174      *
 175      * Dual queues with slack differ from plain M&S dual queues by
 176      * virtue of only sometimes updating head or tail pointers when
 177      * matching, appending, or even traversing nodes; in order to
 178      * maintain a targeted slack.  The idea of "sometimes" may be
 179      * operationalized in several ways. The simplest is to use a
 180      * per-operation counter incremented on each traversal step, and
 181      * to try (via CAS) to update the associated queue pointer
 182      * whenever the count exceeds a threshold. Another, that requires
 183      * more overhead, is to use random number generators to update
 184      * with a given probability per traversal step.
 185      *
 186      * In any strategy along these lines, because CASes updating
 187      * fields may fail, the actual slack may exceed targeted
 188      * slack. However, they may be retried at any time to maintain
 189      * targets.  Even when using very small slack values, this
 190      * approach works well for dual queues because it allows all
 191      * operations up to the point of matching or appending an item
 192      * (hence potentially allowing progress by another thread) to be
 193      * read-only, thus not introducing any further contention. As
 194      * described below, we implement this by performing slack
 195      * maintenance retries only after these points.
 196      *
 197      * As an accompaniment to such techniques, traversal overhead can
 198      * be further reduced without increasing contention of head
 199      * pointer updates: Threads may sometimes shortcut the "next" link
 200      * path from the current "head" node to be closer to the currently
 201      * known first unmatched node, and similarly for tail. Again, this
 202      * may be triggered with using thresholds or randomization.
 203      *
 204      * These ideas must be further extended to avoid unbounded amounts
 205      * of costly-to-reclaim garbage caused by the sequential "next"
 206      * links of nodes starting at old forgotten head nodes: As first
 207      * described in detail by Boehm
 208      * (http://portal.acm.org/citation.cfm?doid=503272.503282) if a GC
 209      * delays noticing that any arbitrarily old node has become
 210      * garbage, all newer dead nodes will also be unreclaimed.
 211      * (Similar issues arise in non-GC environments.)  To cope with
 212      * this in our implementation, upon CASing to advance the head
 213      * pointer, we set the "next" link of the previous head to point
 214      * only to itself; thus limiting the length of connected dead lists.
 215      * (We also take similar care to wipe out possibly garbage
 216      * retaining values held in other Node fields.)  However, doing so
 217      * adds some further complexity to traversal: If any "next"
 218      * pointer links to itself, it indicates that the current thread
 219      * has lagged behind a head-update, and so the traversal must
 220      * continue from the "head".  Traversals trying to find the
 221      * current tail starting from "tail" may also encounter
 222      * self-links, in which case they also continue at "head".
 223      *
 224      * It is tempting in slack-based scheme to not even use CAS for
 225      * updates (similarly to Ladan-Mozes & Shavit). However, this
 226      * cannot be done for head updates under the above link-forgetting
 227      * mechanics because an update may leave head at a detached node.
 228      * And while direct writes are possible for tail updates, they
 229      * increase the risk of long retraversals, and hence long garbage
 230      * chains, which can be much more costly than is worthwhile
 231      * considering that the cost difference of performing a CAS vs
 232      * write is smaller when they are not triggered on each operation
 233      * (especially considering that writes and CASes equally require
 234      * additional GC bookkeeping ("write barriers") that are sometimes
 235      * more costly than the writes themselves because of contention).
 236      *
 237      * *** Overview of implementation ***
 238      *
 239      * We use a threshold-based approach to updates, with a slack
 240      * threshold of two -- that is, we update head/tail when the
 241      * current pointer appears to be two or more steps away from the
 242      * first/last node. The slack value is hard-wired: a path greater
 243      * than one is naturally implemented by checking equality of
 244      * traversal pointers except when the list has only one element,
 245      * in which case we keep slack threshold at one. Avoiding tracking
 246      * explicit counts across method calls slightly simplifies an
 247      * already-messy implementation. Using randomization would
 248      * probably work better if there were a low-quality dirt-cheap
 249      * per-thread one available, but even ThreadLocalRandom is too
 250      * heavy for these purposes.
 251      *
 252      * With such a small slack threshold value, it is not worthwhile
 253      * to augment this with path short-circuiting (i.e., unsplicing
 254      * interior nodes) except in the case of cancellation/removal (see
 255      * below).
 256      *
 257      * We allow both the head and tail fields to be null before any
 258      * nodes are enqueued; initializing upon first append.  This
 259      * simplifies some other logic, as well as providing more
 260      * efficient explicit control paths instead of letting JVMs insert
 261      * implicit NullPointerExceptions when they are null.  While not
 262      * currently fully implemented, we also leave open the possibility
 263      * of re-nulling these fields when empty (which is complicated to
 264      * arrange, for little benefit.)
 265      *
 266      * All enqueue/dequeue operations are handled by the single method
 267      * "xfer" with parameters indicating whether to act as some form
 268      * of offer, put, poll, take, or transfer (each possibly with
 269      * timeout). The relative complexity of using one monolithic
 270      * method outweighs the code bulk and maintenance problems of
 271      * using separate methods for each case.
 272      *
 273      * Operation consists of up to three phases. The first is
 274      * implemented within method xfer, the second in tryAppend, and
 275      * the third in method awaitMatch.
 276      *
 277      * 1. Try to match an existing node
 278      *
 279      *    Starting at head, skip already-matched nodes until finding
 280      *    an unmatched node of opposite mode, if one exists, in which
 281      *    case matching it and returning, also if necessary updating
 282      *    head to one past the matched node (or the node itself if the
 283      *    list has no other unmatched nodes). If the CAS misses, then
 284      *    a loop retries advancing head by two steps until either
 285      *    success or the slack is at most two. By requiring that each
 286      *    attempt advances head by two (if applicable), we ensure that
 287      *    the slack does not grow without bound. Traversals also check
 288      *    if the initial head is now off-list, in which case they
 289      *    start at the new head.
 290      *
 291      *    If no candidates are found and the call was untimed
 292      *    poll/offer, (argument "how" is NOW) return.
 293      *
 294      * 2. Try to append a new node (method tryAppend)
 295      *
 296      *    Starting at current tail pointer, find the actual last node
 297      *    and try to append a new node (or if head was null, establish
 298      *    the first node). Nodes can be appended only if their
 299      *    predecessors are either already matched or are of the same
 300      *    mode. If we detect otherwise, then a new node with opposite
 301      *    mode must have been appended during traversal, so we must
 302      *    restart at phase 1. The traversal and update steps are
 303      *    otherwise similar to phase 1: Retrying upon CAS misses and
 304      *    checking for staleness.  In particular, if a self-link is
 305      *    encountered, then we can safely jump to a node on the list
 306      *    by continuing the traversal at current head.
 307      *
 308      *    On successful append, if the call was ASYNC, return.
 309      *
 310      * 3. Await match or cancellation (method awaitMatch)
 311      *
 312      *    Wait for another thread to match node; instead cancelling if
 313      *    the current thread was interrupted or the wait timed out. On
 314      *    multiprocessors, we use front-of-queue spinning: If a node
 315      *    appears to be the first unmatched node in the queue, it
 316      *    spins a bit before blocking. In either case, before blocking
 317      *    it tries to unsplice any nodes between the current "head"
 318      *    and the first unmatched node.
 319      *
 320      *    Front-of-queue spinning vastly improves performance of
 321      *    heavily contended queues. And so long as it is relatively
 322      *    brief and "quiet", spinning does not much impact performance
 323      *    of less-contended queues.  During spins threads check their
 324      *    interrupt status and generate a thread-local random number
 325      *    to decide to occasionally perform a Thread.yield. While
 326      *    yield has underdefined specs, we assume that might it help,
 327      *    and will not hurt in limiting impact of spinning on busy
 328      *    systems.  We also use smaller (1/2) spins for nodes that are
 329      *    not known to be front but whose predecessors have not
 330      *    blocked -- these "chained" spins avoid artifacts of
 331      *    front-of-queue rules which otherwise lead to alternating
 332      *    nodes spinning vs blocking. Further, front threads that
 333      *    represent phase changes (from data to request node or vice
 334      *    versa) compared to their predecessors receive additional
 335      *    chained spins, reflecting longer paths typically required to
 336      *    unblock threads during phase changes.
 337      *
 338      *
 339      * ** Unlinking removed interior nodes **
 340      *
 341      * In addition to minimizing garbage retention via self-linking
 342      * described above, we also unlink removed interior nodes. These
 343      * may arise due to timed out or interrupted waits, or calls to
 344      * remove(x) or Iterator.remove.  Normally, given a node that was
 345      * at one time known to be the predecessor of some node s that is
 346      * to be removed, we can unsplice s by CASing the next field of
 347      * its predecessor if it still points to s (otherwise s must
 348      * already have been removed or is now offlist). But there are two
 349      * situations in which we cannot guarantee to make node s
 350      * unreachable in this way: (1) If s is the trailing node of list
 351      * (i.e., with null next), then it is pinned as the target node
 352      * for appends, so can only be removed later after other nodes are
 353      * appended. (2) We cannot necessarily unlink s given a
 354      * predecessor node that is matched (including the case of being
 355      * cancelled): the predecessor may already be unspliced, in which
 356      * case some previous reachable node may still point to s.
 357      * (For further explanation see Herlihy & Shavit "The Art of
 358      * Multiprocessor Programming" chapter 9).  Although, in both
 359      * cases, we can rule out the need for further action if either s
 360      * or its predecessor are (or can be made to be) at, or fall off
 361      * from, the head of list.
 362      *
 363      * Without taking these into account, it would be possible for an
 364      * unbounded number of supposedly removed nodes to remain
 365      * reachable.  Situations leading to such buildup are uncommon but
 366      * can occur in practice; for example when a series of short timed
 367      * calls to poll repeatedly time out but never otherwise fall off
 368      * the list because of an untimed call to take at the front of the
 369      * queue.
 370      *
 371      * When these cases arise, rather than always retraversing the
 372      * entire list to find an actual predecessor to unlink (which
 373      * won't help for case (1) anyway), we record a conservative
 374      * estimate of possible unsplice failures (in "sweepVotes").
 375      * We trigger a full sweep when the estimate exceeds a threshold
 376      * ("SWEEP_THRESHOLD") indicating the maximum number of estimated
 377      * removal failures to tolerate before sweeping through, unlinking
 378      * cancelled nodes that were not unlinked upon initial removal.
 379      * We perform sweeps by the thread hitting threshold (rather than
 380      * background threads or by spreading work to other threads)
 381      * because in the main contexts in which removal occurs, the
 382      * caller is already timed-out, cancelled, or performing a
 383      * potentially O(n) operation (e.g. remove(x)), none of which are
 384      * time-critical enough to warrant the overhead that alternatives
 385      * would impose on other threads.
 386      *
 387      * Because the sweepVotes estimate is conservative, and because
 388      * nodes become unlinked "naturally" as they fall off the head of
 389      * the queue, and because we allow votes to accumulate even while
 390      * sweeps are in progress, there are typically significantly fewer
 391      * such nodes than estimated.  Choice of a threshold value
 392      * balances the likelihood of wasted effort and contention, versus
 393      * providing a worst-case bound on retention of interior nodes in
 394      * quiescent queues. The value defined below was chosen
 395      * empirically to balance these under various timeout scenarios.
 396      *
 397      * Note that we cannot self-link unlinked interior nodes during
 398      * sweeps. However, the associated garbage chains terminate when
 399      * some successor ultimately falls off the head of the list and is
 400      * self-linked.
 401      */
 402 
 403     /** True if on multiprocessor */
 404     private static final boolean MP =
 405         Runtime.getRuntime().availableProcessors() > 1;
 406 
 407     /**
 408      * The number of times to spin (with randomly interspersed calls
 409      * to Thread.yield) on multiprocessor before blocking when a node
 410      * is apparently the first waiter in the queue.  See above for
 411      * explanation. Must be a power of two. The value is empirically
 412      * derived -- it works pretty well across a variety of processors,
 413      * numbers of CPUs, and OSes.
 414      */
 415     private static final int FRONT_SPINS   = 1 << 7;
 416 
 417     /**
 418      * The number of times to spin before blocking when a node is
 419      * preceded by another node that is apparently spinning.  Also
 420      * serves as an increment to FRONT_SPINS on phase changes, and as
 421      * base average frequency for yielding during spins. Must be a
 422      * power of two.
 423      */
 424     private static final int CHAINED_SPINS = FRONT_SPINS >>> 1;
 425 
 426     /**
 427      * The maximum number of estimated removal failures (sweepVotes)
 428      * to tolerate before sweeping through the queue unlinking
 429      * cancelled nodes that were not unlinked upon initial
 430      * removal. See above for explanation. The value must be at least
 431      * two to avoid useless sweeps when removing trailing nodes.
 432      */
 433     static final int SWEEP_THRESHOLD = 32;
 434 
 435     /**
 436      * Queue nodes. Uses Object, not E, for items to allow forgetting
 437      * them after use.  Relies heavily on Unsafe mechanics to minimize
 438      * unnecessary ordering constraints: Writes that are intrinsically
 439      * ordered wrt other accesses or CASes use simple relaxed forms.
 440      */
 441     static final class Node {
 442         final boolean isData;   // false if this is a request node
 443         volatile Object item;   // initially non-null if isData; CASed to match
 444         volatile Node next;
 445         volatile Thread waiter; // null until waiting
 446 
 447         // CAS methods for fields
 448         final boolean casNext(Node cmp, Node val) {
 449             return UNSAFE.compareAndSwapObject(this, nextOffset, cmp, val);
 450         }
 451 
 452         final boolean casItem(Object cmp, Object val) {
 453             //            assert cmp == null || cmp.getClass() != Node.class;
 454             return UNSAFE.compareAndSwapObject(this, itemOffset, cmp, val);
 455         }
 456 
 457         /**
 458          * Constructs a new node.  Uses relaxed write because item can
 459          * only be seen after publication via casNext.
 460          */
 461         Node(Object item, boolean isData) {
 462             UNSAFE.putObject(this, itemOffset, item); // relaxed write
 463             this.isData = isData;
 464         }
 465 
 466         /**
 467          * Links node to itself to avoid garbage retention.  Called
 468          * only after CASing head field, so uses relaxed write.
 469          */
 470         final void forgetNext() {
 471             UNSAFE.putObject(this, nextOffset, this);
 472         }
 473 
 474         /**
 475          * Sets item to self and waiter to null, to avoid garbage
 476          * retention after matching or cancelling. Uses relaxed writes
 477          * because order is already constrained in the only calling
 478          * contexts: item is forgotten only after volatile/atomic
 479          * mechanics that extract items.  Similarly, clearing waiter
 480          * follows either CAS or return from park (if ever parked;
 481          * else we don't care).
 482          */
 483         final void forgetContents() {
 484             UNSAFE.putObject(this, itemOffset, this);
 485             UNSAFE.putObject(this, waiterOffset, null);
 486         }
 487 
 488         /**
 489          * Returns true if this node has been matched, including the
 490          * case of artificial matches due to cancellation.
 491          */
 492         final boolean isMatched() {
 493             Object x = item;
 494             return (x == this) || ((x == null) == isData);
 495         }
 496 
 497         /**
 498          * Returns true if this is an unmatched request node.
 499          */
 500         final boolean isUnmatchedRequest() {
 501             return !isData && item == null;
 502         }
 503 
 504         /**
 505          * Returns true if a node with the given mode cannot be
 506          * appended to this node because this node is unmatched and
 507          * has opposite data mode.
 508          */
 509         final boolean cannotPrecede(boolean haveData) {
 510             boolean d = isData;
 511             Object x;
 512             return d != haveData && (x = item) != this && (x != null) == d;
 513         }
 514 
 515         /**
 516          * Tries to artificially match a data node -- used by remove.
 517          */
 518         final boolean tryMatchData() {
 519             //            assert isData;
 520             Object x = item;
 521             if (x != null && x != this && casItem(x, null)) {
 522                 LockSupport.unpark(waiter);
 523                 return true;
 524             }
 525             return false;
 526         }
 527 
 528         // Unsafe mechanics
 529         private static final sun.misc.Unsafe UNSAFE = sun.misc.Unsafe.getUnsafe();
 530         private static final long nextOffset =
 531             objectFieldOffset(UNSAFE, "next", Node.class);
 532         private static final long itemOffset =
 533             objectFieldOffset(UNSAFE, "item", Node.class);
 534         private static final long waiterOffset =
 535             objectFieldOffset(UNSAFE, "waiter", Node.class);
 536 
 537         private static final long serialVersionUID = -3375979862319811754L;
 538     }
 539 
 540     /** head of the queue; null until first enqueue */
 541     transient volatile Node head;
 542 
 543     /** tail of the queue; null until first append */
 544     private transient volatile Node tail;
 545 
 546     /** The number of apparent failures to unsplice removed nodes */
 547     private transient volatile int sweepVotes;
 548 
 549     // CAS methods for fields
 550     private boolean casTail(Node cmp, Node val) {
 551         return UNSAFE.compareAndSwapObject(this, tailOffset, cmp, val);
 552     }
 553 
 554     private boolean casHead(Node cmp, Node val) {
 555         return UNSAFE.compareAndSwapObject(this, headOffset, cmp, val);
 556     }
 557 
 558     private boolean casSweepVotes(int cmp, int val) {
 559         return UNSAFE.compareAndSwapInt(this, sweepVotesOffset, cmp, val);
 560     }
 561 
 562     /*
 563      * Possible values for "how" argument in xfer method.
 564      */
 565     private static final int NOW   = 0; // for untimed poll, tryTransfer
 566     private static final int ASYNC = 1; // for offer, put, add
 567     private static final int SYNC  = 2; // for transfer, take
 568     private static final int TIMED = 3; // for timed poll, tryTransfer
 569 
 570     @SuppressWarnings("unchecked")
 571     static <E> E cast(Object item) {
 572         //        assert item == null || item.getClass() != Node.class;
 573         return (E) item;
 574     }
 575 
 576     /**
 577      * Implements all queuing methods. See above for explanation.
 578      *
 579      * @param e the item or null for take
 580      * @param haveData true if this is a put, else a take
 581      * @param how NOW, ASYNC, SYNC, or TIMED
 582      * @param nanos timeout in nanosecs, used only if mode is TIMED
 583      * @return an item if matched, else e
 584      * @throws NullPointerException if haveData mode but e is null
 585      */
 586     private E xfer(E e, boolean haveData, int how, long nanos) {
 587         if (haveData && (e == null))
 588             throw new NullPointerException();
 589         Node s = null;                        // the node to append, if needed
 590 
 591         retry: for (;;) {                     // restart on append race
 592 
 593             for (Node h = head, p = h; p != null;) { // find & match first node
 594                 boolean isData = p.isData;
 595                 Object item = p.item;
 596                 if (item != p && (item != null) == isData) { // unmatched
 597                     if (isData == haveData)   // can't match
 598                         break;
 599                     if (p.casItem(item, e)) { // match
 600                         for (Node q = p; q != h;) {
 601                             Node n = q.next;  // update by 2 unless singleton
 602                             if (head == h && casHead(h, n == null? q : n)) {
 603                                 h.forgetNext();
 604                                 break;
 605                             }                 // advance and retry
 606                             if ((h = head)   == null ||
 607                                 (q = h.next) == null || !q.isMatched())
 608                                 break;        // unless slack < 2
 609                         }
 610                         LockSupport.unpark(p.waiter);
 611                         return this.<E>cast(item);
 612                     }
 613                 }
 614                 Node n = p.next;
 615                 p = (p != n) ? n : (h = head); // Use head if p offlist
 616             }
 617 
 618             if (how != NOW) {                 // No matches available
 619                 if (s == null)
 620                     s = new Node(e, haveData);
 621                 Node pred = tryAppend(s, haveData);
 622                 if (pred == null)
 623                     continue retry;           // lost race vs opposite mode
 624                 if (how != ASYNC)
 625                     return awaitMatch(s, pred, e, (how == TIMED), nanos);
 626             }
 627             return e; // not waiting
 628         }
 629     }
 630 
 631     /**
 632      * Tries to append node s as tail.
 633      *
 634      * @param s the node to append
 635      * @param haveData true if appending in data mode
 636      * @return null on failure due to losing race with append in
 637      * different mode, else s's predecessor, or s itself if no
 638      * predecessor
 639      */
 640     private Node tryAppend(Node s, boolean haveData) {
 641         for (Node t = tail, p = t;;) {        // move p to last node and append
 642             Node n, u;                        // temps for reads of next & tail
 643             if (p == null && (p = head) == null) {
 644                 if (casHead(null, s))
 645                     return s;                 // initialize
 646             }
 647             else if (p.cannotPrecede(haveData))
 648                 return null;                  // lost race vs opposite mode
 649             else if ((n = p.next) != null)    // not last; keep traversing
 650                 p = p != t && t != (u = tail) ? (t = u) : // stale tail
 651                     (p != n) ? n : null;      // restart if off list
 652             else if (!p.casNext(null, s))
 653                 p = p.next;                   // re-read on CAS failure
 654             else {
 655                 if (p != t) {                 // update if slack now >= 2
 656                     while ((tail != t || !casTail(t, s)) &&
 657                            (t = tail)   != null &&
 658                            (s = t.next) != null && // advance and retry
 659                            (s = s.next) != null && s != t);
 660                 }
 661                 return p;
 662             }
 663         }
 664     }
 665 
 666     /**
 667      * Spins/yields/blocks until node s is matched or caller gives up.
 668      *
 669      * @param s the waiting node
 670      * @param pred the predecessor of s, or s itself if it has no
 671      * predecessor, or null if unknown (the null case does not occur
 672      * in any current calls but may in possible future extensions)
 673      * @param e the comparison value for checking match
 674      * @param timed if true, wait only until timeout elapses
 675      * @param nanos timeout in nanosecs, used only if timed is true
 676      * @return matched item, or e if unmatched on interrupt or timeout
 677      */
 678     private E awaitMatch(Node s, Node pred, E e, boolean timed, long nanos) {
 679         long lastTime = timed ? System.nanoTime() : 0L;
 680         Thread w = Thread.currentThread();
 681         int spins = -1; // initialized after first item and cancel checks
 682         ThreadLocalRandom randomYields = null; // bound if needed
 683 
 684         for (;;) {
 685             Object item = s.item;
 686             if (item != e) {                  // matched
 687                 //                assert item != s;
 688                 s.forgetContents();           // avoid garbage
 689                 return this.<E>cast(item);
 690             }
 691             if ((w.isInterrupted() || (timed && nanos <= 0)) &&
 692                     s.casItem(e, s)) {        // cancel
 693                 unsplice(pred, s);
 694                 return e;
 695             }
 696 
 697             if (spins < 0) {                  // establish spins at/near front
 698                 if ((spins = spinsFor(pred, s.isData)) > 0)
 699                     randomYields = ThreadLocalRandom.current();
 700             }
 701             else if (spins > 0) {             // spin
 702                 --spins;
 703                 if (randomYields.nextInt(CHAINED_SPINS) == 0)
 704                     Thread.yield();           // occasionally yield
 705             }
 706             else if (s.waiter == null) {
 707                 s.waiter = w;                 // request unpark then recheck
 708             }
 709             else if (timed) {
 710                 long now = System.nanoTime();
 711                 if ((nanos -= now - lastTime) > 0)
 712                     LockSupport.parkNanos(this, nanos);
 713                 lastTime = now;
 714             }
 715             else {
 716                 LockSupport.park(this);
 717             }
 718         }
 719     }
 720 
 721     /**
 722      * Returns spin/yield value for a node with given predecessor and
 723      * data mode. See above for explanation.
 724      */
 725     private static int spinsFor(Node pred, boolean haveData) {
 726         if (MP && pred != null) {
 727             if (pred.isData != haveData)      // phase change
 728                 return FRONT_SPINS + CHAINED_SPINS;
 729             if (pred.isMatched())             // probably at front
 730                 return FRONT_SPINS;
 731             if (pred.waiter == null)          // pred apparently spinning
 732                 return CHAINED_SPINS;
 733         }
 734         return 0;
 735     }
 736 
 737     /* -------------- Traversal methods -------------- */
 738 
 739     /**
 740      * Returns the successor of p, or the head node if p.next has been
 741      * linked to self, which will only be true if traversing with a
 742      * stale pointer that is now off the list.
 743      */
 744     final Node succ(Node p) {
 745         Node next = p.next;
 746         return (p == next) ? head : next;
 747     }
 748 
 749     /**
 750      * Returns the first unmatched node of the given mode, or null if
 751      * none.  Used by methods isEmpty, hasWaitingConsumer.
 752      */
 753     private Node firstOfMode(boolean isData) {
 754         for (Node p = head; p != null; p = succ(p)) {
 755             if (!p.isMatched())
 756                 return (p.isData == isData) ? p : null;
 757         }
 758         return null;
 759     }
 760 
 761     /**
 762      * Returns the item in the first unmatched node with isData; or
 763      * null if none.  Used by peek.
 764      */
 765     private E firstDataItem() {
 766         for (Node p = head; p != null; p = succ(p)) {
 767             Object item = p.item;
 768             if (p.isData) {
 769                 if (item != null && item != p)
 770                     return this.<E>cast(item);
 771             }
 772             else if (item == null)
 773                 return null;
 774         }
 775         return null;
 776     }
 777 
 778     /**
 779      * Traverses and counts unmatched nodes of the given mode.
 780      * Used by methods size and getWaitingConsumerCount.
 781      */
 782     private int countOfMode(boolean data) {
 783         int count = 0;
 784         for (Node p = head; p != null; ) {
 785             if (!p.isMatched()) {
 786                 if (p.isData != data)
 787                     return 0;
 788                 if (++count == Integer.MAX_VALUE) // saturated
 789                     break;
 790             }
 791             Node n = p.next;
 792             if (n != p)
 793                 p = n;
 794             else {
 795                 count = 0;
 796                 p = head;
 797             }
 798         }
 799         return count;
 800     }
 801 
 802     final class Itr implements Iterator<E> {
 803         private Node nextNode;   // next node to return item for
 804         private E nextItem;      // the corresponding item
 805         private Node lastRet;    // last returned node, to support remove
 806         private Node lastPred;   // predecessor to unlink lastRet
 807 
 808         /**
 809          * Moves to next node after prev, or first node if prev null.
 810          */
 811         private void advance(Node prev) {
 812             lastPred = lastRet;
 813             lastRet = prev;
 814             for (Node p = (prev == null) ? head : succ(prev);
 815                  p != null; p = succ(p)) {
 816                 Object item = p.item;
 817                 if (p.isData) {
 818                     if (item != null && item != p) {
 819                         nextItem = LinkedTransferQueue.this.<E>cast(item);
 820                         nextNode = p;
 821                         return;
 822                     }
 823                 }
 824                 else if (item == null)
 825                     break;
 826             }
 827             nextNode = null;
 828         }
 829 
 830         Itr() {
 831             advance(null);
 832         }
 833 
 834         public final boolean hasNext() {
 835             return nextNode != null;
 836         }
 837 
 838         public final E next() {
 839             Node p = nextNode;
 840             if (p == null) throw new NoSuchElementException();
 841             E e = nextItem;
 842             advance(p);
 843             return e;
 844         }
 845 
 846         public final void remove() {
 847             Node p = lastRet;
 848             if (p == null) throw new IllegalStateException();
 849             if (p.tryMatchData())
 850                 unsplice(lastPred, p);
 851         }
 852     }
 853 
 854     /* -------------- Removal methods -------------- */
 855 
 856     /**
 857      * Unsplices (now or later) the given deleted/cancelled node with
 858      * the given predecessor.
 859      *
 860      * @param pred a node that was at one time known to be the
 861      * predecessor of s, or null or s itself if s is/was at head
 862      * @param s the node to be unspliced
 863      */
 864     final void unsplice(Node pred, Node s) {
 865         s.forgetContents(); // forget unneeded fields
 866         /*
 867          * See above for rationale. Briefly: if pred still points to
 868          * s, try to unlink s.  If s cannot be unlinked, because it is
 869          * trailing node or pred might be unlinked, and neither pred
 870          * nor s are head or offlist, add to sweepVotes, and if enough
 871          * votes have accumulated, sweep.
 872          */
 873         if (pred != null && pred != s && pred.next == s) {
 874             Node n = s.next;
 875             if (n == null ||
 876                 (n != s && pred.casNext(s, n) && pred.isMatched())) {
 877                 for (;;) {               // check if at, or could be, head
 878                     Node h = head;
 879                     if (h == pred || h == s || h == null)
 880                         return;          // at head or list empty
 881                     if (!h.isMatched())
 882                         break;
 883                     Node hn = h.next;
 884                     if (hn == null)
 885                         return;          // now empty
 886                     if (hn != h && casHead(h, hn))
 887                         h.forgetNext();  // advance head
 888                 }
 889                 if (pred.next != pred && s.next != s) { // recheck if offlist
 890                     for (;;) {           // sweep now if enough votes
 891                         int v = sweepVotes;
 892                         if (v < SWEEP_THRESHOLD) {
 893                             if (casSweepVotes(v, v + 1))
 894                                 break;
 895                         }
 896                         else if (casSweepVotes(v, 0)) {
 897                             sweep();
 898                             break;
 899                         }
 900                     }
 901                 }
 902             }
 903         }
 904     }
 905 
 906     /**
 907      * Unlinks matched (typically cancelled) nodes encountered in a
 908      * traversal from head.
 909      */
 910     private void sweep() {
 911         for (Node p = head, s, n; p != null && (s = p.next) != null; ) {
 912             if (!s.isMatched())
 913                 // Unmatched nodes are never self-linked
 914                 p = s;
 915             else if ((n = s.next) == null) // trailing node is pinned
 916                 break;
 917             else if (s == n)    // stale
 918                 // No need to also check for p == s, since that implies s == n
 919                 p = head;
 920             else
 921                 p.casNext(s, n);
 922         }
 923     }
 924 
 925     /**
 926      * Main implementation of remove(Object)
 927      */
 928     private boolean findAndRemove(Object e) {
 929         if (e != null) {
 930             for (Node pred = null, p = head; p != null; ) {
 931                 Object item = p.item;
 932                 if (p.isData) {
 933                     if (item != null && item != p && e.equals(item) &&
 934                         p.tryMatchData()) {
 935                         unsplice(pred, p);
 936                         return true;
 937                     }
 938                 }
 939                 else if (item == null)
 940                     break;
 941                 pred = p;
 942                 if ((p = p.next) == pred) { // stale
 943                     pred = null;
 944                     p = head;
 945                 }
 946             }
 947         }
 948         return false;
 949     }
 950 
 951 
 952     /**
 953      * Creates an initially empty {@code LinkedTransferQueue}.
 954      */
 955     public LinkedTransferQueue() {
 956     }
 957 
 958     /**
 959      * Creates a {@code LinkedTransferQueue}
 960      * initially containing the elements of the given collection,
 961      * added in traversal order of the collection's iterator.
 962      *
 963      * @param c the collection of elements to initially contain
 964      * @throws NullPointerException if the specified collection or any
 965      *         of its elements are null
 966      */
 967     public LinkedTransferQueue(Collection<? extends E> c) {
 968         this();
 969         addAll(c);
 970     }
 971 
 972     /**
 973      * Inserts the specified element at the tail of this queue.
 974      * As the queue is unbounded, this method will never block.
 975      *
 976      * @throws NullPointerException if the specified element is null
 977      */
 978     public void put(E e) {
 979         xfer(e, true, ASYNC, 0);
 980     }
 981 
 982     /**
 983      * Inserts the specified element at the tail of this queue.
 984      * As the queue is unbounded, this method will never block or
 985      * return {@code false}.
 986      *
 987      * @return {@code true} (as specified by
 988      *  {@link BlockingQueue#offer(Object,long,TimeUnit) BlockingQueue.offer})
 989      * @throws NullPointerException if the specified element is null
 990      */
 991     public boolean offer(E e, long timeout, TimeUnit unit) {
 992         xfer(e, true, ASYNC, 0);
 993         return true;
 994     }
 995 
 996     /**
 997      * Inserts the specified element at the tail of this queue.
 998      * As the queue is unbounded, this method will never return {@code false}.
 999      *
1000      * @return {@code true} (as specified by
1001      *         {@link BlockingQueue#offer(Object) BlockingQueue.offer})
1002      * @throws NullPointerException if the specified element is null
1003      */
1004     public boolean offer(E e) {
1005         xfer(e, true, ASYNC, 0);
1006         return true;
1007     }
1008 
1009     /**
1010      * Inserts the specified element at the tail of this queue.
1011      * As the queue is unbounded, this method will never throw
1012      * {@link IllegalStateException} or return {@code false}.
1013      *
1014      * @return {@code true} (as specified by {@link Collection#add})
1015      * @throws NullPointerException if the specified element is null
1016      */
1017     public boolean add(E e) {
1018         xfer(e, true, ASYNC, 0);
1019         return true;
1020     }
1021 
1022     /**
1023      * Transfers the element to a waiting consumer immediately, if possible.
1024      *
1025      * <p>More precisely, transfers the specified element immediately
1026      * if there exists a consumer already waiting to receive it (in
1027      * {@link #take} or timed {@link #poll(long,TimeUnit) poll}),
1028      * otherwise returning {@code false} without enqueuing the element.
1029      *
1030      * @throws NullPointerException if the specified element is null
1031      */
1032     public boolean tryTransfer(E e) {
1033         return xfer(e, true, NOW, 0) == null;
1034     }
1035 
1036     /**
1037      * Transfers the element to a consumer, waiting if necessary to do so.
1038      *
1039      * <p>More precisely, transfers the specified element immediately
1040      * if there exists a consumer already waiting to receive it (in
1041      * {@link #take} or timed {@link #poll(long,TimeUnit) poll}),
1042      * else inserts the specified element at the tail of this queue
1043      * and waits until the element is received by a consumer.
1044      *
1045      * @throws NullPointerException if the specified element is null
1046      */
1047     public void transfer(E e) throws InterruptedException {
1048         if (xfer(e, true, SYNC, 0) != null) {
1049             Thread.interrupted(); // failure possible only due to interrupt
1050             throw new InterruptedException();
1051         }
1052     }
1053 
1054     /**
1055      * Transfers the element to a consumer if it is possible to do so
1056      * before the timeout elapses.
1057      *
1058      * <p>More precisely, transfers the specified element immediately
1059      * if there exists a consumer already waiting to receive it (in
1060      * {@link #take} or timed {@link #poll(long,TimeUnit) poll}),
1061      * else inserts the specified element at the tail of this queue
1062      * and waits until the element is received by a consumer,
1063      * returning {@code false} if the specified wait time elapses
1064      * before the element can be transferred.
1065      *
1066      * @throws NullPointerException if the specified element is null
1067      */
1068     public boolean tryTransfer(E e, long timeout, TimeUnit unit)
1069         throws InterruptedException {
1070         if (xfer(e, true, TIMED, unit.toNanos(timeout)) == null)
1071             return true;
1072         if (!Thread.interrupted())
1073             return false;
1074         throw new InterruptedException();
1075     }
1076 
1077     public E take() throws InterruptedException {
1078         E e = xfer(null, false, SYNC, 0);
1079         if (e != null)
1080             return e;
1081         Thread.interrupted();
1082         throw new InterruptedException();
1083     }
1084 
1085     public E poll(long timeout, TimeUnit unit) throws InterruptedException {
1086         E e = xfer(null, false, TIMED, unit.toNanos(timeout));
1087         if (e != null || !Thread.interrupted())
1088             return e;
1089         throw new InterruptedException();
1090     }
1091 
1092     public E poll() {
1093         return xfer(null, false, NOW, 0);
1094     }
1095 
1096     /**
1097      * @throws NullPointerException     {@inheritDoc}
1098      * @throws IllegalArgumentException {@inheritDoc}
1099      */
1100     public int drainTo(Collection<? super E> c) {
1101         if (c == null)
1102             throw new NullPointerException();
1103         if (c == this)
1104             throw new IllegalArgumentException();
1105         int n = 0;
1106         E e;
1107         while ( (e = poll()) != null) {
1108             c.add(e);
1109             ++n;
1110         }
1111         return n;
1112     }
1113 
1114     /**
1115      * @throws NullPointerException     {@inheritDoc}
1116      * @throws IllegalArgumentException {@inheritDoc}
1117      */
1118     public int drainTo(Collection<? super E> c, int maxElements) {
1119         if (c == null)
1120             throw new NullPointerException();
1121         if (c == this)
1122             throw new IllegalArgumentException();
1123         int n = 0;
1124         E e;
1125         while (n < maxElements && (e = poll()) != null) {
1126             c.add(e);
1127             ++n;
1128         }
1129         return n;
1130     }
1131 
1132     /**
1133      * Returns an iterator over the elements in this queue in proper
1134      * sequence, from head to tail.
1135      *
1136      * <p>The returned iterator is a "weakly consistent" iterator that
1137      * will never throw
1138      * {@link ConcurrentModificationException ConcurrentModificationException},
1139      * and guarantees to traverse elements as they existed upon
1140      * construction of the iterator, and may (but is not guaranteed
1141      * to) reflect any modifications subsequent to construction.
1142      *
1143      * @return an iterator over the elements in this queue in proper sequence
1144      */
1145     public Iterator<E> iterator() {
1146         return new Itr();
1147     }
1148 
1149     public E peek() {
1150         return firstDataItem();
1151     }
1152 
1153     /**
1154      * Returns {@code true} if this queue contains no elements.
1155      *
1156      * @return {@code true} if this queue contains no elements
1157      */
1158     public boolean isEmpty() {
1159         for (Node p = head; p != null; p = succ(p)) {
1160             if (!p.isMatched())
1161                 return !p.isData;
1162         }
1163         return true;
1164     }
1165 
1166     public boolean hasWaitingConsumer() {
1167         return firstOfMode(false) != null;
1168     }
1169 
1170     /**
1171      * Returns the number of elements in this queue.  If this queue
1172      * contains more than {@code Integer.MAX_VALUE} elements, returns
1173      * {@code Integer.MAX_VALUE}.
1174      *
1175      * <p>Beware that, unlike in most collections, this method is
1176      * <em>NOT</em> a constant-time operation. Because of the
1177      * asynchronous nature of these queues, determining the current
1178      * number of elements requires an O(n) traversal.
1179      *
1180      * @return the number of elements in this queue
1181      */
1182     public int size() {
1183         return countOfMode(true);
1184     }
1185 
1186     public int getWaitingConsumerCount() {
1187         return countOfMode(false);
1188     }
1189 
1190     /**
1191      * Removes a single instance of the specified element from this queue,
1192      * if it is present.  More formally, removes an element {@code e} such
1193      * that {@code o.equals(e)}, if this queue contains one or more such
1194      * elements.
1195      * Returns {@code true} if this queue contained the specified element
1196      * (or equivalently, if this queue changed as a result of the call).
1197      *
1198      * @param o element to be removed from this queue, if present
1199      * @return {@code true} if this queue changed as a result of the call
1200      */
1201     public boolean remove(Object o) {
1202         return findAndRemove(o);
1203     }
1204 
1205     /**
1206      * Always returns {@code Integer.MAX_VALUE} because a
1207      * {@code LinkedTransferQueue} is not capacity constrained.
1208      *
1209      * @return {@code Integer.MAX_VALUE} (as specified by
1210      *         {@link BlockingQueue#remainingCapacity()})
1211      */
1212     public int remainingCapacity() {
1213         return Integer.MAX_VALUE;
1214     }
1215 
1216     /**
1217      * Saves the state to a stream (that is, serializes it).
1218      *
1219      * @serialData All of the elements (each an {@code E}) in
1220      * the proper order, followed by a null
1221      * @param s the stream
1222      */
1223     private void writeObject(java.io.ObjectOutputStream s)
1224         throws java.io.IOException {
1225         s.defaultWriteObject();
1226         for (E e : this)
1227             s.writeObject(e);
1228         // Use trailing null as sentinel
1229         s.writeObject(null);
1230     }
1231 
1232     /**
1233      * Reconstitutes the Queue instance from a stream (that is,
1234      * deserializes it).
1235      *
1236      * @param s the stream
1237      */
1238     private void readObject(java.io.ObjectInputStream s)
1239         throws java.io.IOException, ClassNotFoundException {
1240         s.defaultReadObject();
1241         for (;;) {
1242             @SuppressWarnings("unchecked") E item = (E) s.readObject();
1243             if (item == null)
1244                 break;
1245             else
1246                 offer(item);
1247         }
1248     }
1249 
1250     // Unsafe mechanics
1251 
1252     private static final sun.misc.Unsafe UNSAFE = sun.misc.Unsafe.getUnsafe();
1253     private static final long headOffset =
1254         objectFieldOffset(UNSAFE, "head", LinkedTransferQueue.class);
1255     private static final long tailOffset =
1256         objectFieldOffset(UNSAFE, "tail", LinkedTransferQueue.class);
1257     private static final long sweepVotesOffset =
1258         objectFieldOffset(UNSAFE, "sweepVotes", LinkedTransferQueue.class);
1259 
1260     static long objectFieldOffset(sun.misc.Unsafe UNSAFE,
1261                                   String field, Class<?> klazz) {
1262         try {
1263             return UNSAFE.objectFieldOffset(klazz.getDeclaredField(field));
1264         } catch (NoSuchFieldException e) {
1265             // Convert Exception to corresponding Error
1266             NoSuchFieldError error = new NoSuchFieldError(field);
1267             error.initCause(e);
1268             throw error;
1269         }
1270     }
1271 }