Algorithm Alley Heaps are usually implemented via binary trees, with the property that for every subtree, the root is the minimum item. Here, John describes how to implement exceptionally fast "Fibonacci" heaps. By John Boyer, Dr. Dobb's Journal ene 01, 1997 URL:http://www.ddj.com/184410119

The Fibonacci Heap In September 1996, you saw how a simple tree structure can improve the performance of a resizablearray class. The idea was not to make every operation fast, but to keep the average cost low by making expensive operations infrequent. That same idea appears again this month, as John shows us how a roughly balanced tree of circularly linked lists can be used to implement a very fast heap. --Tim Kientzle John is a software development manager at UWI Unisoft Wares Inc. in Victoria, British Columbia and is a part-time graduate student at the University of Victoria. He can be contacted at jboyer@uwi.com. Heaps are simple, useful containers. A heap allows you to insert elements and extract the least element. Many heap implementations also allow you to decrease an element already in the heap, and there are a variety of less-common operations. Table 1 shows the operations supported by the Fibonacci heap implementation I'm going to discuss in this article. One of the first uses for a heap was to implement a priority queue. In fact, before researchers began realizing the wealth of algorithms to which a heap is well suited, the heap was actually called a "priority queue." Priority queues are used to keep a dynamic list of tasks of differing priorities. The Insert() operation adds a new job to the queue. The ExtractMin() operation extracts the highest-priority task. If a job suddenly required a higher priority, the DecreaseKey() operation would be used. A heap can be used to implement a worst-case O(n log) sorting algorithm, which is the best-possible rating for a sort that uses only key comparisons. You simply insert all elements into the heap, then ExtractMin() until the heap is empty. The items will be extracted in ascending order. Heaps can also be used to construct optimal binary trees for Huffman compression, as shown in Mark Nelson's article "Priority Queues and the STL" (Dr. Dobb's Journal, January 1996). Function Insert()

Description Inserts a new node into the heap; the new node must contain a key value.

ExtractMin() Returns the node of minimum value after removing it from the heap. DecreaseKey( Assigns a new, smaller key value to a node; the node may need to be ) repositioned in the heap so that it is extracted when there are no nodes with lesser values than the NEW key value. A pointer to the node must be given because heaps don't support an efficient search operation. Union()

Creates a new heap by joining two heaps given as input.

Minimum()

Returns a reference to the node containing the minimum key value or some indication of what the key value is.

Delete()

Deletes any node from the heap. A pointer to the node must be given.

Table 1: Heap operations. One important algorithm that uses a heap is Dijkstra's shortest-path algorithm. This algorithm finds the least expensive path through a weighted graph (also called a "network"). Dijkstra's algorithm sets the cost of each vertex (except the starting vertex) to infinity and puts all the vertices onto a heap. You then extract the cheapest vertex from the heap -- call it M -- and examine each vertex A adjacent to M. If the cost of M plus the cost of the edge joining M to A is cheaper than the current cost of A (that is, if there's a cheap path to A through M), you create a link from A to M and decrease A's key to represent the new cost. You continue extracting successive nodes until you reach T, the target vertex. The value of T is the cost of the shortest path. The links from T back to the starting vertex indicate the shortest path. Input: Graph G, vertices S (start), T (terminate) Declare: H (initially empty heap) 1: For all vertices v 2: if v == S then v.cost := 0 3: else v.cost := infinity 3: Insert v into H 4: Repeat 5: M := ExtractMin(H) 6: For each vertex A attached to M 7: w := cost of edge from M to A 8: if (M.cost + w < A.cost) 9: DecreaseKey(A,M.cost + w) 10: A.backlink := M 11: Until M = T 12: Output T.cost 13: Output vertices on chain of backlinks from T to S

As you can see in Figure 1, the DecreaseKey() on line 9 is the most time-consuming operation of the inner loop. Since Dijkstra's algorithm is important in network routing and other applications, it would be nice to find a heap implementation that makes this operation as fast as possible. This is the primary motivation for the Fibonacci heap.

The Fibonacci Heap

Heaps are usually implemented using binary trees, with the Figure 1: Dijkstra's shortest-path algorithm. property that for every subtree, the root is the minimum item. In 1984, Michael Fredman and Robert Tarjan described a new way to implement heaps. In particular, the Fibonacci heap, or F-heap, is exceptionally fast at the DecreaseKey() and Insert() operations. For a typical binary heap, these operations require logarithmic time, while a Fibonacci heap requires only constant time. Table 2 shows how other operations compare. There are some caveats, however. First, a Fibonacci heap uses more memory than a binary heap, since it requires a number of additional data elements to keep track of the items. Second, the time efficiency of the different operations is based on "amortized analysis." With the binary heap, the time reflects the total time for that operation. For an F-heap, a particular call to ExtractMin(), for example, might take a very long time because it's doing leftover work from other operations. With amortized analysis, this additional work is accounted for in the operations that cause the work.

Behind the Scenes The Fibonacci heap stores all elements in a collection of circular, doubly linked lists. In addition to the Left and Right pointers used to implement the lists, each node has a Child pointer that allows it to be

operations, this gives you some idea of how DecreaseKey() can achieve constant amortized time. The Delete() operation is actually remarkably simple. Each node has a special Negative Infinity flag that forces it to have a value smaller than any other node. To delete a node, you effectively decrease the key to negative infinity, then extract it. Since ExtractMin() is O(log), so is Delete().

A Fix for the Expandable Binary Heap I've used the same basic design to build a dynamic binary heap. This is an unusual thing to do. Usually, binary heaps are declared to be of a certain size and don't grow or shrink. An expandable binary heap must be constructed with great care to ensure that the Insert() and ExtractMin() operations don't degrade to O(n) behavior. Specifically, you must only grow the heap log times, doubling the heap array size each time an expansion is necessary. This will ensure that the nodes will be copied to a new array a maximum of 1+2+4+...+n= 2n-1 times, so the cost of expansion is constant per insertion. Likewise, the heap array should be reduced to half its size when it is only one-quarter full. If it is reduced to half size at precisely the point when it is half full, then a sequence of Insert() and ExtractMin() operations could alternate right at that moment, causing expansion and shrinking at every operation.

How to Use the Code The source code for this Fibonacci heap implementation (available electronically; see "Availability," page 3) defines two classes: FibHeapNode and FibHeap. The FibHeap class provides the heap operations such as Insert() and ExtractMin(). It is intended to be used as is; no subclassing is required. The FibHeapNode class should be subclassed to store your particular data and to redefine the virtual functions used by FibHeap. The file FIBTEST.CPP shows how this subclassing should be done. In particular, when overriding the assignment, equality, and less-than functions, you must call the corresponding protected base-class function first. For example, FHN_Cmp() handles the Negative Infinity test, so you should not do your own test if the base class function indicates a meaningful value.

Binary Heap versus F-Heap The F-heap provides a great enhancement to Dijkstra's algorithm and to other algorithms that can use DecreaseKey() effectively. The big surprise, though, is that the F-heap is even competitive on regular heap algorithms like heap sorting. The test programs generate random test data and compare the output against qsort() to make sure the heap is operating correctly. To determine the overall time complexity, you can compare the time for 2048-element and 1024-element data sets. If the process is O(n log), the ratio should be 2.2 to 1. The test program averages a ratio of 2.17 for a binary heap and 2.07 for a Fibonacci heap. The decreased ratio is due to the fact that more of the F-heap operations execute in linear time, including the Insert() and DecreaseKey() operations. In addition, the Fibonacci heap test runs about 15 percent faster than the binary heap test. Even if you remove the DecreaseKey() operation from the test, the Fibonacci heap is still over 10 percent faster. For algorithms like Dijkstra's, the difference can be two to ten times faster on a 1024-vertex graph.

References Cormen, T., C. Leiserson, and R. Rivest. Introduction to Algorithms. Cambridge, MA: MIT Press, 1990. Fredman, M. and Tarjan, R. "Fibonacci Heaps and Their Uses in Improved Network Optimization

Algorithms." Journal of the Association for Computing Machinery, vol. 34, no. 3, July 1987. DDJ Listing One //=====================================================================// ExtractMin() - O(n) worst-case actual; O(lg n) amortized //=====================================================================

FibHeapNode *FibHeap::ExtractMin() { FibHeapNode *Result; FibHeap *ChildHeap = NULL;

// Remove minimum node and set MinRoot to next node if ((Result = Minimum()) == NULL) return NULL; MinRoot = Result->Right; Result->Right->Left = Result->Left; Result->Left->Right = Result->Right; Result->Left = Result->Right = NULL;

NumNodes --; if (Result->Mark) { NumMarkedNodes --; Result->Mark = 0; } Result->Degree = 0;

// Attach child list of Minimum node to the root list of the heap // If there is no child list, then do no work if (Result->Child == NULL) { if (MinRoot == Result) MinRoot = NULL; } // If MinRoot==Result then there was only one root tree, so the root list is // the child list of that node (NULL if this is the last node in the list) else if (MinRoot == Result) MinRoot = Result->Child; // If MinRoot is different, then the child list is pushed into a new temporary // heap, which is then merged by Union() onto the root list of this heap. else { ChildHeap = new FibHeap(); ChildHeap->MinRoot = Result->Child; } // Complete the disassociation of the Result node from the heap if (Result->Child != NULL) Result->Child->Parent = NULL; Result->Child = Result->Parent = NULL;

// If there was a child list, then we now merge it with rest of the root list if (ChildHeap) Union(ChildHeap); // Consolidate heap to find new minimum and do reorganize work if (MinRoot != NULL) _Consolidate(); // Return the minimum node, which is now disassociated with the heap // It has Left, Right, Parent, Child, Mark and Degree cleared. return Result; } //==================================================================== // Consolidate(). Internal function that reorganizes heap as part of an // ExtractMin(). We must find new minimum in heap, which could be anywhere // along the root list. The search could be O(n) since all nodes could be on // the root list. So, we reorganize the tree into more of a binomial forest // structure, and then find the new minimum on the consolidated O(lg n) sized // root list, and in the process set each Parent pointer to NULL, // and count the number of resulting subtrees. // After a list of n inserts, there will be n nodes on the root list, // so the first ExtractMin() will be O(n) regardless of whether or not we // consolidate. However, the consolidation causes subsequent ExtractMin() // operations to be O(lg n). Furthermore, the extra cost of the first // ExtractMin() is covered by the higher amortized cost of Insert(), which is // the real governing factor in how costly the first ExtractMin() will be. //===================================================================== void FibHeap::_Consolidate() { FibHeapNode *x, *y, *w; FibHeapNode *A[1+8*sizeof(long)]; // 1+lg(n) int I=0, Dn = 1+8*sizeof(long); short d;

// Initialize the consolidation detection array for (I=0; I < Dn; I++) A[I] = NULL; // We need to loop through all elements on root list. When a collision of // degree is found, the two trees are consolidated in favor of the one with // the lesser element key value. We first need to break the circle so that we // can have a stopping condition (we can't go around until we reach the tree // we started with because all root trees are subject to becoming a child // during the consolidation). MinRoot->Left->Right = NULL; MinRoot->Left = NULL; w = MinRoot;

do { x = w; d = x->Degree; w = w->Right; // We need another loop here because the consolidated result // may collide with another large tree on the root list. while (A[d] != NULL) { y = A[d]; if (*y < *x)

_Exchange(x, y); if (w == y) w = y->Right; _Link(y, x); A[d] = NULL; d++; } A[d] = x; } while (w != NULL); // Now we rebuild the root list, find the new minimum, set all root list // nodes' parent pointers to NULL and count the number of subtrees. MinRoot = NULL; NumTrees = 0; for (I = 0; I < Dn; I++) if (A[I] != NULL) _AddToRootList(A[I]); } //===================================================================== void FibHeap::_AddToRootList(FibHeapNode *x) { if (x->Mark) NumMarkedNodes --; x->Mark = 0; NumNodes--; Insert(x); } //==== Node y is moved from the root list to become a subtree of node x. ==== void FibHeap::_Link(FibHeapNode *y, FibHeapNode *x) { // Remove node y from root list if (y->Right != NULL) y->Right->Left = y->Left; if (y->Left != NULL) y->Left->Right = y->Right; NumTrees--; // Make node y a singleton circular list with a parent of x y->Left = y->Right = y; y->Parent = x; // If node x has no children, then list y is its new child list if (x->Child == NULL) x->Child = y; // Otherwise, node y must be added to node x's child list else { y->Left = x->Child; y->Right = x->Child->Right; x->Child->Right = y; y->Right->Left = y; } // Increase the degree of node x because it's now a bigger tree x->Degree ++; // Node y has just been made a child, so clear its mark if (y->Mark) NumMarkedNodes--; y->Mark = 0; }

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Listing Two //=====================================================================// DecreaseKey() - O(lg n) actual; O(1) amortized // The O(lg n) actual cost stems from the fact that the depth, and // therefore the number of ancestor parents, is bounded by O(lg n). //=====================================================================

int FibHeap::DecreaseKey(FibHeapNode *theNode, FibHeapNode& NewKey) { FibHeapNode *theParent;

if (theNode==NULL || *theNode < NewKey) return NOTOK; *theNode = NewKey;

theParent = theNode->Parent; if (theParent != NULL && *theNode < *theParent) { _Cut(theNode, theParent); _CascadingCut(theParent); } if (*theNode < *MinRoot) MinRoot = theNode; return OK;

} //==== Remove node x from the child list of its parent node y ==== void FibHeap::_Cut(FibHeapNode *x, FibHeapNode *y) { if (y->Child == x) y->Child = x->Right; if (y->Child == x) y->Child = NULL; y->Degree --;

x->Left->Right = x->Right; x->Right->Left = x->Left;

_AddToRootList(x); } //===================================================================== // Cuts each node in parent list, putting successive ancestor nodes on the root // list until we either arrive at the root list or until we find an ancestor // that is unmarked. When a mark is set (which only happens during a cascading // cut), it means that one child subtree has been lost; if a second subtree is // lost later during another cascading cut, then we move the node to the root // list so that it can be re-balanced on the next consolidate. //=====================================================================

void FibHeap::_CascadingCut(FibHeapNode *y) { FibHeapNode *z = y->Parent;

while (z != NULL) { if (y->Mark == 0) { y->Mark = 1; NumMarkedNodes++; z = NULL; } else { _Cut(y, z); y = z; z = y->Parent; } } }

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Copyright ÂŠ 1997, Dr. Dobb's Journal

The Fibonacci Heap

By John Boyer

Figure 2: The ExtractMin() consolidation process. (a) The heap after inserting values 0-12 and extracting 0. Now, start from 11 and consolidate the heap; (b) 10 and 11 both had degree zero, so were joined; (c) 8 and 9 were joined; (d) 8 and 10

both had degree one; (e) 7,6,5, and 4 were consolidated. (f) Eight and 4 both had degree two; (g) Finished. One has degree zero, 2 has degree one, 4 has degree three. Note that every element is smaller than all of its children. BACK TO ARTICLE

Copyright ÂŠ 1997, Dr. Dobb's Journal

The Fibonacci Heap

By John Boyer

Table 2: Comparing the binary and Fibonacci heaps. means that the operation's time complexity is bounded both above and below--it won't take longer, but it won't take significantly less time, either. The O means that the time complexity is only bounded above: The operation won't take longer, but it may (under certain best-case conditions) take less than the stated time. BACK TO ARTICLE

Copyright ÂŠ 1997, Dr. Dobb's Journal

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