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CSE 326: Data Structures: Graphs - PowerPoint PPT Presentation

CSE 326: Data Structures: Graphs. Lecture 23: Wednesday, March 5 th , 2003. Today. All pairs shortest paths NP completeness Will finish on Friday. All Pairs Shortest Path. C ij = the weight of the edge i j Let D k,ij = the cost of the cheapest path i j of length  k

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CSE 326: Data Structures: Graphs

Lecture 23:Wednesday, March 5th, 2003

• All pairs shortest paths

• NP completeness

• Will finish on Friday

• Cij = the weight of the edge ij

• Let Dk,ij = the cost of the cheapest path ij of length  k

• This is not the same as in Floyd-Warshall yet

Dk,ij

i

Cij

j

• What is D0,ij = ?

• What is Dk+1,ij = (in terms of Dk,ij) ?

• What is the cost of the shortest path i  j ?

• What is D0,ij = ?

D0,ij = 0

• What is Dk+1,ij = (in terms of Dk,ij) ?

Dk+1,ij = min0m<n (Cim + Dk,mj) for k  0

• What is the cost of the shortest path i  j ?

Dn,ij

for (i = 0; i < n; i++) for (j = 0; j < n; j++)

D[i][j] = 0.0;

for (k = 0; k < n; k++) {

for (i = 0; i < n; i++) for (j = 0; j < n; j++) {

D’[i][j] = ;

for (m=0; m<n; m++)

D’[i][j] = min(D’[i][j], D[i][m]+C[m][j]);

D = D’

}

Run time = O(n4)

We could save space and use only D (not D’), but the main problemis the running time O(n4)

D2k,ij = min1mn (Dk,im + Dk,mj) for k > 1

Hence, compute D1, D2, D4, D8, . . .

Done after log n steps

for (i = 0; i < n; i++) for (j = 0; j < n; j++)

D[i][j] = C[i][j]; /* need to start from k=1 */

for (k = 1; k < N; k = 2*k) {

for (i = 0; i < n; i++) for (j = 0; j < n; j++) {

D’[i][j] = ;

for (m=0; m<n; m++)

D’[i][j] = min(D’[i][j], D[i][m]+D[m][j]);

D = D’

}

Run time = O(n3 log n)

• Cij = the weight of the edge ij

• Let Dk,ij = the cost of the cheapest path ij that goes only through nodes 0, 1, ..., k-1

nodes0, 1, ..., k-1

Dk,ij

i

Here i, j  k

j

nodes0, 1, ..., k-1

Dk,ij

i

Here i, j < k

j

The cases i < k  jand j < k  i are also possible

• What is D0,ij = ?

• What is Dk+1,ij = (in terms of Dk,ij) ?

• What is the cost of the shortest path i  j ?

• What is D0,ij = ?

D0,ij = Cij

• What is Dk+1,ij = (in terms of Dk,ij) ?

Dk+1,ij = min(Dk,ij, Dk,ik + Dk,kj) for k > 0

• What is the cost of the shortest path i  j ?

Dn,ij

for (i = 0; i < n; i++) for (j = 0; j < n; j++)

D[i][j] = C[i][j];

for (k = 0; k < n; k++) {

for (i = 0; i < n; i++)

for (j = 0; j < n; j++)

D’[i][j] = min(D’[i][j], D[i][k]+C[k][j]);

D = D’

}

Run time = O(n3)

Dk+1,ij = min(Dk,ij, Dk,ik + Dk,kj) for k > 0

Notice that Dk+1, ik = Dk, ik and Dk+1, kj = Dk, kj;

hence we can use a single matrix, Di, j !

• Really hard problems

• Solving pencil-on-paper puzzles

• A “deep” algorithm for Euler Circuits

• Euler with a twist: Hamiltonian circuits

• Hamiltonian circuits and NP complete problems

• The NP =? P problem

• Your chance to win a Turing award!

• Any takers?

• Weiss Chapter 9.7

L. Euler

(1707-1783)

W. R. Hamilton

(1805-1865)

Which of these can you draw without lifting your

pencil, drawing each line only once?

Can you start and end at the same point?

PREGEL

KNEIPHOFF

Want to cross all bridges but…

Can cross each bridge only once (High toll to cross twice?!)

Find a path that

traverses every edge

exactly once

• Euler tour: a path through a graph that visits each edge exactly once

• Euler circuit: an Euler tour that starts and ends at the same vertex

• Named after Leonhard Euler (1707-1783), who cracked this problem and founded graph theory in 1736

• Some observations for undirected graphs:

• An Euler circuit is only possible if the graph is connected and each vertex has even degree (= # of edges on the vertex)[Why?]

• An Euler tour is only possible if the graph is connected and either all vertices have even degree or exactly two have odd degree [Why?]

• Problem: Given an undirected graph G = (V,E), find an Euler circuit in G

• Note: Can check if one exists in linear time (how?)

• Given that an Euler circuit exists, how do we construct an Euler circuit for G?

• Hint: Think deep! We’ve discussed the answer in depth before…

• Given a graph G = (V,E), find an Euler circuit in G

• Can check if one exists in O(|V|) time (check degrees)

• Basic Euler Circuit Algorithm:

• Do a depth-first search (DFS) from a vertex until you are back at this vertex

• Pick a vertex on this path with an unused edge and repeat 1.

• Splice all these paths into an Euler circuit

• Running time = O(|V| + |E|)

A

B

C

B

C

G

G

G

D

E

D

E

D

E

F

DFS(G) :

G D E G

Splice

at G

DFS(B) :

B G C B

DFS(A) :

A B D F E C A

A BG D E GC B D F E C A

Splice at B

A B G C B D F E C A

C

B

C

G

G

D

E

D

E

Euler with a Twist: Hamiltonian Circuits

• Euler circuit: A cycle that goes through each edge exactly once

• Hamiltonian circuit: A cycle that goes through each vertex exactly once

• Does graph I have:

• An Euler circuit?

• A Hamiltonian circuit?

• Does graph II have:

• An Euler circuit?

• A Hamiltonian circuit?

I

II

• Problem: Find a Hamiltonian circuit in a graph G = (V,E)

• Sub-problem: Does G contain a Hamiltonian circuit?

• No known easy algorithm for checking this…

• One solution: Search through all paths to find one that visits each vertex exactly once

• Can use your favorite graph search algorithm (DFS!) to find various paths

• This is an exhaustive search (“brute force”) algorithm

• Worst case  need to search all paths

• How many paths??

B

C

• Worst case  need to search all paths

• How many paths?

• Can depict these paths as a search tree

• Let the average branching factor of each node in this tree be B

• |V| vertices, each with  B branches

• Total number of paths B·B·B … ·B

= O(B|V|)

• Worst case  Exponential time!

G

D

E

B

D G C

G E D E C G E

Etc.

Search tree of paths from B

• Most of our algorithms so far have been O(log N), O(N), O(N log N) or O(N2) running time for inputs of size N

• These are all polynomial time algorithms

• Their running time is O(Nk) for some k > 0

• Exponential time BNis asymptotically worse thanany polynomial function Nk for any k

• For any k, Nk is (BN) for any constant B > 1

• The set P is defined as the set of all problems that can be solved in polynomial worse case time

• Also known as the polynomial time complexity class

• All problems that have some algorithm whose running time is O(Nk) for some k

• Examples of problems in P: tree search, sorting, shortest path, Euler circuit, etc.

• Definition: NP is the set of all problems for which a given candidate solution can be tested in polynomial time

• Example of a problem in NP:

• Hamiltonian circuit problem: Why is it in NP?

• Definition: NP is the set of all problems for which a given candidate solution can be tested in polynomial time

• Example of a problem in NP:

• Hamiltonian circuit problem: Why is it in NP?

• Given a candidate path, can test in linear time if it is a Hamiltonian circuit – just check if all vertices are visited exactly once in the candidate path (except start/finish vertex)

• NP stands for Nondeterministic Polynomial time

• Why “nondeterministic”? Corresponds to algorithms that can guess a solution (if it exists)  the solution is then verified to be correct in polynomial time

• Nondeterministic algorithms don’t exist – purely theoretical idea invented to understand how hard a problem could be

• Examples of problems in NP:

• Hamiltonian circuit: Given a candidate path, can test in linear time if it is a Hamiltonian circuit

• Sorting: Can test in linear time if a candidate ordering is sorted

• Are any other problems in P also in NP?

• Are any other problems in P also in NP?

• YES! All problems in P are also in NP

• Notation: P  NP

• If you can solve a problem in polynomial time, can definitely verify a solution in polynomial time

• Question: Are all problems in NP also in P?

• Is NP  P?

• I wished I could tell you that NP ⊈P, but I can’t

• SAT: Given a formula in Boolean logic, e.g.

determine if there is an assignment of values to the variables that makes the formula true (=1).

• Why is it in NP?

• Cook (1971) showed the following:

• In some sense, SAT is the hardest problem in NP

• We say that “SAT is NP-Hard”

• A problem that is NP-Hard and in NP is called NP-complete

Theorem

Suppose that we can solve the SAT problem in polynomial time.

Then there is a way to solve ANY NP problem in polynomial time !!!

• Proof of Cook’s theorem:

• Suppose we can solve SAT in time O(m7), where m is the size of the formula

• Let some other problem in NP: we can check a candidate solution in, say, time O(n5), where n is the size of the problem’s input

• To solve that other problem, do the following

• We have a program A that checks some candidate solution in time O(n5)

• Construct a HUGE boolean formula that represents the execution of A: its variables are the candidate solution (which we don’t know)

• Then check if this formula is satisfiable (i.e. there exists some candidate solution)

Boolean expressionsize = n5 x n5

Boolean expressionsize = n5 x n5

SAT is NP-Complete: Proof

Programcounter

Candidatesolution (unknown)

Memory(at most n5 memory words (why ?))

Input

Time = 0

Time = 1

Time = n5

• What is special about SAT ?

• Nothing ! There are hundreds of NP-complete problems:

• Vertex Cover (VC):

• Hamiltonean Cycle (HC):

Theorem If we can solve VC in polynomial time, then we can solve SAT in polynomial time.

Theorem If we can solve HC in polynomial time, then we can solve VC in polynomial time

• Computers and Intractability: A Guide to the Theory of NP-Completeness, by Michael S. Garey and David S. Johnson