2018/12/27 chapter25

2018/12/27 chapter25

2018/12/27 chapter25

2018/12/27 chapter25

d* Spacing of C ≤d(p, q)≤d*. 2018/12/27 chapter25

An Example K=3. 2018/12/27 chapter25

4.4 Single-Source Shortest Paths Problem Definition Shortest paths and Relaxation Dijkstra’s algorithm (can be viewed as a greedy algorithm) 2018/12/27 chapter25

Problem Definition: Real problem: A motorist wishes to find the shortest possible route from Chicago to Boston.Given a road map of the United States on which the distance between each pair of adjacent intersections is marked, how can we determine this shortest route? Formal definition: Given a directed graph G=(V, E, W), where each edge has a weight, find a shortest path from s to v for some interesting vertices s and v. s—source v—destination. 2018/12/27 chapter25

Find a shortest path from station A to station B. -need serious thinking to get a correct algorithm. 2018/12/27 chapter25

The cost of the shortest path from s to v is denoted as (s, v). The weight of path p=<v0,v1,…,vk > is the sum of the weights of its constituent edges: The cost of the shortest path from s to v is denoted as (s, v). 2018/12/27 chapter25

Negative-Weight edges: Edge weight may be negative. negative-weight cycles– the total weight in the cycle (circuit) is negative. If no negative-weight cycles reachable from the source s, then for all v V, the shortest-path weight remains well defined,even if it has a negative value. If there is a negative-weight cycle on some path from s to v, we define = - . 2018/12/27 chapter25

a b -4 h i 3 -1 2 4 3 c d 6 8 5 -8 3 5 11 g s -3 e 3 f 2 7 j -6 Figure1 Negative edge weights in a directed graph.Shown within each vertex is its shortest-path weight from source s.Because vertices e and f form a negative-weight cycle reachable from s,they have shortest-path weights of - . Because vertex g is reachable from a vertex whose shortest path is - ,it,too,has a shortest-path weight of - .Vertices such as h, i ,and j are not reachable from s,and so their shortest-path weights are , even though they lie on a negative-weight cycle. 2018/12/27 chapter25

Representing shortest paths: we maintain for each vertex vV , a predecessor [ v] that is the vertex in the shortest path right before v. With the values of , a backtracking process can give the shortest path. (We will discuss that after the algorithm is given) 2018/12/27 chapter25

Observation: (basic) Suppose that a shortest path p from a source s to a vertex v can be decomposed into s u v for some vertex u and path p’. Then, the weight of a shortest path from s to v is We do not know what is u for v, but we know u is in V and we can try all nodes in V in O(n) time. Also, if u does not exist, the edge (s, v) is the shortest. Question: how to find (s, u), the first shortest from s to some node? 2018/12/27 chapter25

Relaxation: The process of relaxing an edge (u,v) consists of testing whether we can improve the shortest path to v found so far by going through u and,if so,updating d[v] and [v]. RELAX(u,v,w) if d[v]>d[u]+w(u,v) then d[v] d[u]+w(u,v) (based on observation) [v] u 2018/12/27 chapter25

u v u v 2 2 5 9 5 6 RELAX(u,v) RELAX(u,v) u v u v 2 2 5 7 5 6 (a) (b) Figure2 Relaxation of an edge (u,v).The shortest-path estimate of each vertex is shown within the vertex. (a)Because d[v]>d[u]+w(u,v) prior to relaxation, the value of d[v] decreases. (b)Here, d[v] d[u]+w(u,v) before the relaxation step,so d[v] is unchanged by relaxation. 2018/12/27 chapter25

Initialization: For each vertex v  V, d[v] denotes an upper bound on the weight of a shortest path from source s to v. d[v]– will be (s, v) after the execution of the algorithm. initialize d[v] and [v] as follows: . INITIALIZE-SINGLE-SOURCE(G,s) for each vertex v  V[G] do d[v] [v] NIL d[s] 0 2018/12/27 chapter25

Dijkstra’s Algorithm: Dijkstra’s algorithm assumes that w(e)0 for each e in the graph. maintain a set S of vertices such that Every vertex v S, d[v]=(s, v), i.e., the shortest-path from s to v has been found. (Intial values: S=empty, d[s]=0 and d[v]=) (a) select the vertex uV-S such that d[u]=min {d[x]|x V-S}. Set S=S{u} (b) for each node v adjacent to u do RELAX(u, v, w). Repeat step (a) and (b) until S=V. 2018/12/27 chapter25

Continue: DIJKSTRA(G,w,s): INITIALIZE-SINGLE-SOURCE(G,s) S Q V[G] while Q do u EXTRACT -MIN(Q) S S {u} for each vertex v  Adj[u] do RELAX(u,v,w) 2018/12/27 chapter25

Implementation: a priority queue Q stores vertices in V-S, keyed by their d[] values. the graph G is represented by adjacency lists. 2018/12/27 chapter25

u v 10 5 2 1 3 4 6 9 7 8 s Single Source Shortest Path Problem x y (a) 2018/12/27 chapter25

u v 1 10/s 8 10 9 s 2 3 4 6 7 5 5/s 8 2 x y (b) (s,x) is the shortest path using one edge. It is also the shortest path from s to x. 2018/12/27 chapter25

u v 1 8/x 14/x 10 9 s 2 3 4 6 7 5 5/s 7/x 2 x y (c) 2018/12/27 chapter25

u v 1 8/x 13/y 10 9 s 2 3 4 6 7 5 5/s 7/x 2 x y (d) 2018/12/27 chapter25

7/x 9/u 5/s 8/x 10 5 2 1 3 4 6 9 7 s u v x y (e) 2018/12/27 chapter25

Backtracking: v-u-x-s 1 8/x 9/u 10 9 s 2 3 4 6 7 5 5/s 7/x 2 x y (f) Backtracking: v-u-x-s 2018/12/27 chapter25

Proof: We prove it by induction on |S|. Theorem: Consider the set S at any time in the algorithm’s execution. For each vS, the path Pv is a shortest s-v path. Proof: We prove it by induction on |S|. If |S|=1, then the theorem holds. (Because d[s]=0 and S={s}.) Suppose that the theorem is true for |S|=k for some k>0. Now, we grow S to size k+1 by adding the node v. 2018/12/27 chapter25

Proof: (continue) y x That is, the length of any path d[v]. s u v Now, we grow S to size k+1 by adding the node v. Let (u, v) be the last edge on our s-v path Pv. Consider any other path from P: s,…,x,y, …, v. (red in the Fig.) Case 1: y is the first node that is not in S and xS. Since we always select the node with the smallest value d[] in the algorithm, we have d[v]d[y]. Moreover, the length of each edge is 0. Thus, the length of Pd[y]d[v]. That is, the length of any path d[v]. y x Case 2: such a y does not exist. d[v]=d[u]+w(u, v)d[x]+w(x, v). That is, the length of any path d[v]. s u v Set S 2018/12/27 chapter25

S->v is shorter than s->u, but it is longer than The algorithm does not work if there are negative weight edges in the graph . u -10 2 v s 1 S->v is shorter than s->u, but it is longer than s->u->v. 2018/12/27 chapter25

Time complexity of Dijkstra’s Algorithm: Time complexity depends on implementation of the Queue. Method 1: Use an array to story the Queue EXTRACT -MIN(Q) --takes O(|V|) time. Totally, there are |V| EXTRACT -MIN(Q)’s. time for |V| EXTRACT -MIN(Q)’s is O(|V|2). RELAX(u,v,w) --takes O(1) time. Totally |E| RELAX(u, v, w)’s are required. time for |E| RELAX(u,v,w)’s is O(|E|). Total time required is O(|V|2+|E|)=O(|V|2) Backtracking with [] gives the shortest path in inverse order. Method 2: The priority queue is implemented as a adaptable heap. It takes O(log n) time to do EXTRACT-MIN(Q). The total running time is O(|E|log n ). 2018/12/27 chapter25

A problem Let us design a keyboard for a mechanical hand. The keyboard has 26 letters A, B, …, Z arranged in one row. The hand is always at the left end of the row and it comes back to the left end after pressing a key. Assume that we know the frequency of every letter. Design the order of the 26 letters in the row such that the average length of movement of the mechanical hand is minimized. Prove that your solution is correct. 2018/12/27 chapter25