Dinic's algorithm

Yefim Dinitz invented this algorithm in response to a pre-class exercise in Adelson-Velsky's algorithms class. At the time he was not aware of the basic facts regarding the Ford–Fulkerson algorithm.[2]

Dinitz mentions inventing his algorithm in January 1969, which was published in 1970 in the journal Doklady Akademii Nauk SSSR. In 1974, Shimon Even and (his then Ph.D. student) Alon Itai at the Technion in Haifa were very curious and intrigued by Dinitz's algorithm as well as Alexander V. Karzanov's related idea of blocking flow. However it was hard for them to decipher these two papers, each being limited to four pages to meet the restrictions of journal Doklady Akademii Nauk SSSR. Even did not give up, and after three days of effort managed to understand both papers except for the layered network maintenance issue. Over the next couple of years, Even gave lectures on "Dinic's algorithm", mispronouncing the name of the author while popularizing it. Even and Itai also contributed to this algorithm by combining BFS and DFS, which is how the algorithm is now commonly presented.[3]

For about 10 years of time after the Ford–Fulkerson algorithm was invented, it was unknown if it could be made to terminate in polynomial time in the general case of irrational edge capacities. This caused a lack of any known polynomial-time algorithm to solve the max flow problem in generic cases. Dinitz's algorithm and the Edmonds–Karp algorithm (published in 1972) both independently showed that in the Ford–Fulkerson algorithm, if each augmenting path is the shortest one, then the length of the augmenting paths is non-decreasing and the algorithm always terminates.

Let ${\displaystyle G=((V,E),c,f,s,t)}$ be a network with ${\displaystyle c(u,v)}$ and ${\displaystyle f(u,v)}$ the capacity and the flow of the edge ${\displaystyle (u,v)}$, respectively.

The residual capacity is a mapping ${\displaystyle c_{f}\colon V\times V\to R^{+}}$ defined as,

1. if ${\displaystyle (u,v)\in E}$,

   ${\displaystyle c_{f}(u,v)=c(u,v)-f(u,v)}$

2. ${\displaystyle c_{f}(u,v)=0}$ otherwise.

The residual graph is an unweighted graph ${\displaystyle G_{f}=((V,E_{f}),c_{f}|_{E_{f}},s,t)}$, where

${\displaystyle E_{f}=\{(u,v)\in V\times V\colon \;c_{f}(u,v)>0\}}$.

An augmenting path is an ${\displaystyle s}$–${\displaystyle t}$ path in the residual graph ${\displaystyle G_{f}}$.

Define ${\displaystyle \operatorname {dist} (v)}$ to be the length of the shortest path from ${\displaystyle s}$ to ${\displaystyle v}$ in ${\displaystyle G_{f}}$. Then the level graph of ${\displaystyle G_{f}}$ is the graph ${\displaystyle G_{L}=((V,E_{L}),c_{f}|_{E_{L}},s,t)}$, where

${\displaystyle E_{L}=\{(u,v)\in E_{f}\colon \;\operatorname {dist} (v)=\operatorname {dist} (u)+1\}}$.

A blocking flow is an ${\displaystyle s}$–${\displaystyle t}$ flow ${\displaystyle f}$ such that the graph ${\displaystyle G'=((V,E_{L}'),s,t)}$ with ${\displaystyle E_{L}'=\{(u,v)\colon \;f(u,v)<c_{f}|_{E_{L}}(u,v)\}}$ contains no ${\displaystyle s}$–${\displaystyle t}$ path.[4][5]

Dinic's Algorithm

Input: A network ${\displaystyle G=((V,E),c,s,t)}$.

Output: An ${\displaystyle s}$–${\displaystyle t}$ flow ${\displaystyle f}$ of maximum value.

1. Set ${\displaystyle f(e)=0}$ for each ${\displaystyle e\in E}$.
2. Construct ${\displaystyle G_{L}}$ from ${\displaystyle G_{f}}$ of ${\displaystyle G}$. If ${\displaystyle \operatorname {dist} (t)=\infty }$, stop and output ${\displaystyle f}$.
3. Find a blocking flow ${\displaystyle f'}$ in ${\displaystyle G_{L}}$.
4. Add augment flow ${\displaystyle f}$ by ${\displaystyle f'}$ and go back to step 2.

It can be shown that the number of layers in each blocking flow increases by at least 1 each time and thus there are at most ${\displaystyle |V|-1}$ blocking flows in the algorithm. For each of them:

• the level graph ${\displaystyle G_{L}}$ can be constructed by breadth-first search in ${\displaystyle O(E)}$ time
• a blocking flow in the level graph ${\displaystyle G_{L}}$ can be found in ${\displaystyle O(VE)}$ time

with total running time ${\displaystyle O(E+VE)=O(VE)}$ for each layer. As a consequence, the running time of Dinic's algorithm is ${\displaystyle O(V^{2}E)}$.[6]

Using a data structure called dynamic trees, the running time of finding a blocking flow in each phase can be reduced to ${\displaystyle O(E\log V)}$ and therefore the running time of Dinic's algorithm can be improved to ${\displaystyle O(VE\log V)}$.

The following is a simulation of Dinic's algorithm. In the level graph ${\displaystyle G_{L}}$, the vertices with labels in red are the values ${\displaystyle \operatorname {dist} (v)}$. The paths in blue form a blocking flow.

	${\displaystyle G}$	${\displaystyle G_{f}}$	${\displaystyle G_{L}}$
1.
	The blocking flow consists of ${\displaystyle \{s,1,3,t\}}$ with 4 units of flow, ${\displaystyle \{s,1,4,t\}}$ with 6 units of flow, and ${\displaystyle \{s,2,4,t\}}$ with 4 units of flow. Therefore, the blocking flow is of 14 units and the value of flow ${\displaystyle |f|}$ is 14. Note that each augmenting path in the blocking flow has 3 edges.
2.
	The blocking flow consists of ${\displaystyle \{s,2,4,3,t\}}$ with 5 units of flow. Therefore, the blocking flow is of 5 units and the value of flow ${\displaystyle |f|}$ is 14 + 5 = 19. Note that each augmenting path has 4 edges.
3.
	Since ${\displaystyle t}$ cannot be reached in ${\displaystyle G_{f}}$, the algorithm terminates and returns a flow with maximum value of 19. Note that in each blocking flow, the number of edges in the augmenting path increases by at least 1.

• Ford–Fulkerson algorithm
• Maximum flow problem

• Yefim Dinitz (2006). "Dinitz' Algorithm: The Original Version and Even's Version" (PDF). In Oded Goldreich; Arnold L. Rosenberg; Alan L. Selman (eds.). Theoretical Computer Science: Essays in Memory of Shimon Even. Springer. pp. 218–240. ISBN 978-3-540-32880-3.
• Tarjan, R. E. (1983). Data structures and network algorithms.CS1 maint: ref=harv (link)
• B. H. Korte; Jens Vygen (2008). "8.4 Blocking Flows and Fujishige's Algorithm". Combinatorial Optimization: Theory and Algorithms (Algorithms and Combinatorics, 21). Springer Berlin Heidelberg. pp. 174–176. ISBN 978-3-540-71844-4.