# Articulation Points

Let's define what an *articulation point* is. We say that a vertex $$$V$$$ in a graph $$$G$$$ with $$$C$$$ connected components is an *articulation point* if its removal increases the number of connected components of $$$G$$$. In other words, let $$$C'$$$ be the number of connected components after removing vertex $$$V$$$, if $$$C' > C$$$ then $$$V$$$ is an *articulation point*.

## How to find articulation points?

## Naive approach O(V * (V + E))

```
For every vertex V in the graph G do
Remove V from G
if the number of connected components increases then V is an articulation point
Add V back to G
```

## Tarjan's approach O(V + E)

First, we need to know that an **ancestor** of some node $$$V$$$ is a node $$$A$$$ that was discoverd before $$$V$$$ in a DFS traversal.

In the graph $$$G_1$$$ shown above, if we start our DFS from **A** and follow the path to **C** through **B** ( **A** -> **B** -> **C** ), then **A** is an ancestor of **B** and **C** in this spanning tree generated from the DFS traversal.

#### Example of DFS spanning trees of a graph

Now that we know the definition of **ancestor** let's dive into the main idea.

### Idea

Let's say there is a node $$$V$$$ in some graph $$$G$$$ that can be reached by a node $$$U$$$ through some intermediate nodes (maybe non intermediate nodes) following some DFS traversal, if $$$V$$$ can also be reached by $$$A$$$ = "ancestor of $$$U$$$" without passing through $$$U$$$ then, $$$U$$$ is NOT an articulation point because it means that if we remove $$$U$$$ from $$$G$$$ we can still reach $$$V$$$ from $$$A$$$, hence, the number of *connected components* will remain the same.

So, we can conclude that the only 2 conditions for $$$U$$$ to be an *articulation point* are:

If all paths from $$$A$$$ to $$$V$$$ require $$$U$$$ to be in the graph.

If $$$U$$$ is the root of the DFS traversal with at least 2 children subgraphs disconnected from each other.

Then we can break condition #1 into 2 subconditions:

- $$$U$$$ is an
*articulation point*if it does not have an adyacent node $$$V$$$ that can reach $$$A$$$ without requiring $$$U$$$ to be in $$$G$$$.

- $$$U$$$ is an
*articulation point*if it is the root of some cycle in the DFS traversal.

### Examples:

Here **B** is an articulation point because all paths from ancestors of **B** to **C** require **B** to be in the graph.

Here **B** is NOT an articulation point because there is at least one path from an ancestor of **B** to **C** which does not require **B**.

Here **B** is an articulation point since it has at least 2 children subgraphs disconnected from each other.

### Implementation

Well, first thing we need is a way to know if some node $$$A$$$ is ancestor of some other node $$$V$$$, for this we can assign a *discovery time* to each vertex $$$V$$$ in the graph $$$G$$$ based on the DFS traversal, so that we can know which node was discovered before or after another. e.g. in $$$G_1$$$ with the traversal **A** -> **B** -> **C** the dicovery times for each node will be respectively 1, 2, 3; with this we know that **A** was discovered before **C** since `discovery_time[A] < discovery_time[C]`

.

Now we need to know if some vertex $$$U$$$ is an articulation point. So, for that we will check the following conditions:

If there is NO way to get to a node $$$V$$$ with

**strictly**smaller discovery time than the discovery time of $$$U$$$ following the DFS traversal, then $$$U$$$ is an articulation point. (it has to be**strictly**because if it is equal it means that $$$U$$$ is the root of a cycle in the DFS traversal which means that $$$U$$$ is still an*articulation point*).If $$$U$$$ is the root of the DFS tree and it has at least 2 children subgraphs disconnected from each other, then $$$U$$$ is an articulation point.

So, for implementation details, we will think of it as if for every node $$$U$$$ we have to find the node $$$V$$$ with the least discovery time that can be reached from $$$U$$$ following some DFS traversal path which does not require to pass **through** any already visited nodes, and let's call this node $$$low$$$.

Then, we can know that $$$U$$$ is an articulation point if the following condition is satisfied: `discovery_time[U] <= low[V]`

( $$$V$$$ in this case represents an adjacent node of $$$U$$$ ). To implement this, in each node $$$V$$$ we will store some identifier of its corresponding node $$$low$$$ found, this identifier will be the corresponding $$$low's$$$ discovery time because it helps us to know when the node $$$low$$$ was discovered, hence it helps us to know by which node we can discover $$$U$$$ first.

### C++ Code

```
// adj[u] = adjacent nodes of u
// ap = AP = articulation points
// p = parent
// disc[u] = discovery time of u
// low[u] = 'low' node of u
int dfsAP(int u, int p) {
int children = 0;
low[u] = disc[u] = ++Time;
for (int& v : adj[u]) {
if (v == p) continue; // we don't want to go back through the same path.
// if we go back is because we found another way back
if (!disc[v]) { // if V has not been discovered before
children++;
dfsAP(v, u); // recursive DFS call
if (disc[u] <= low[v]) // condition #1
ap[u] = 1;
low[u] = min(low[u], low[v]); // low[v] might be an ancestor of u
} else // if v was already discovered means that we found an ancestor
low[u] = min(low[u], disc[v]); // finds the ancestor with the least discovery time
}
return children;
}
void AP() {
ap = low = disc = vector<int>(adj.size());
Time = 0;
for (int u = 0; u < adj.size(); u++)
if (!disc[u])
ap[u] = dfsAP(u, u) > 1; // condition #2
}
```

## Bridges

Let's define what a *bridge* is. We say that an edge $$$UV$$$ in a graph $$$G$$$ with $$$C$$$ connected components is a *bridge* if its removal increases the number of connected components of $$$G$$$. In other words, let $$$C'$$$ be number of connected components after removing edge $$$UV$$$, if $$$C' > C$$$ then the edge $$$UV$$$ is a *bridge*.

The idea for the implementation is exactly the same as for *articulation points* except for one thing, to say that the edge $$$UV$$$ is a bridge, the condition to satisfy is: `discovery_time[U] < low[V]`

instead of `discovery_time[U] <= low[V]`

. Notice that the only change was comparing strictly lesser instead of lesser of equal.

#### But why is this ?

If `discovery_time[U]`

is equal to `low[V]`

it means that there is a path from $$$V$$$ that goes back to $$$U$$$ ( $$$V$$$ in this case represents an adjacent node of $$$U$$$ ), or in other words we can just say that we found a cycle rooted in $$$U$$$. For *articulation points* if we remove $$$U$$$ from the graph it will increase the number of connected components, but in the case of *bridges* if we remove the edge $$$UV$$$ the number of connected components will remain the same. For *bridges* we need to be sure that the edge $$$UV$$$ is not involved in any cycle. A way to be sure of this is just to check that `low[V]`

is strictly greater than `discovery_time[U]`

.

In the graph shown above the edge $$$AB$$$ is a *bridge* because `low[B]`

is strictly greater than `disc[A]`

. The edge $$$BC$$$ is not a *bridge* because `low[C]`

is equal to `disc[B]`

.

### C++ Code

```
// br = bridges, p = parent
vector<pair<int, int>> br;
int dfsBR(int u, int p) {
low[u] = disc[u] = ++Time;
for (int& v : adj[u]) {
if (v == p) continue; // we don't want to go back through the same path.
// if we go back is because we found another way back
if (!disc[v]) { // if V has not been discovered before
dfsBR(v, u); // recursive DFS call
if (disc[u] < low[v]) // condition to find a bridge
br.push_back({u, v});
low[u] = min(low[u], low[v]); // low[v] might be an ancestor of u
} else // if v was already discovered means that we found an ancestor
low[u] = min(low[u], disc[v]); // finds the ancestor with the least discovery time
}
}
void BR() {
low = disc = vector<int>(adj.size());
Time = 0;
for (int u = 0; u < adj.size(); u++)
if (!disc[u])
dfsBR(u, u)
}
```

## FAQ

- Why
`low[u] = min(low[u], disc[v])`

instead of`low[u] = min(low[u], low[v])`

?

Let's consider node **C** in the graph above, in the DFS traversal the nodes after **C** are: **D** and **E**, when the DFS traversal reaches **E** we find **C** again, if we take its $$$low$$$ time, `low[E]`

will be equal to `disc[A]`

but at this point, when we return back to **C** in the DFS we will be omitting the fact that $$$U$$$ is the **root of a cycle** (which makes it an *articulation point*) and we will be saying that there is a path from **E** to some ancestor of **C** (in this case **A**) which does not require **C** and such path does not exist in the graph, therefore the algorithm will say that **C** is NOT an *articulation point* which is totally false since the only way to reach **D** and **E** is passing through **C**.

Good explanation, nice draws

$$$+\text{TREE}(\text{G}(64))$$$ $$$\text{prro :v}$$$ $$$\square$$$

The best explanation that I found, i've been looking for someone who could explain this subject, and I think I found that guy. +10 and to favorite.

Auto comment: topic has been updated by searleser97can you also explain how to find the biconnected components?

Sure, I will be elaborating on that on another post.

I am still waiting for the explanation of biconnected components

Good tutorial with nice explanations and examples

I think there is a little mistake

Thanks, I will fix it

In articulation point code can we write. low[u]=min(low[u],low[v]) instead of low[u]=min(low[u],disc[v])??

No, we can't, you might want to check the last drawing of the post where I give an explanation exactly of what you are asking.

one doubt, help please can i get all the edges which are part of a cycle by changing the condition in bridge code ??

You can create an array containing the parents of each of the nodes in the path, however you might be looking for

Strongly Connected Componentswhich uses a very similar idea. I recommend you to read about that topic. Now that you understood Tarjan's Idea it will be very straight forward for you to understandStrongly Connected Componentsyes,i know about that but i guess it's complexity is (exponential) very bad. That is why i am looking for an aternate .Thank you btw

How did you make these drawings?

They look great.

I used google drawings :D

I really couldn't understand what do you mean by

`So, for implementation details, we will think of it as if for every node U we have to find the node V with the least discovery time that can be reached from U following some DFS traversal path which does not require to pass through any already visited nodes, and let's call this node low.`

?To be specific, I didn't understand the meaning of

`low`

?`low`

will contain the lowest discovery time of each node`v`

, remember that if we find a cycle then all the nodes in such cycle will have the same`low discovery time`

.`low[v]`

will help us to detect whether or not we found a back edge i.e. an edge going back to the same path where we came from.`remember that if we find a cycle then all the nodes in such cycle will have the same low discovery time`

— why it will same? Can you explain this part a bit? ThanksThe condition

`if (disc[u] <= low[v]) // condition #1 ap[u] = 1;`

Would pass for 3 nodes cylic graph and will treat the root node as Articulation point (Which is ideally not the Articulation point). Please correct me If I am wrong.That is why we handle the root case with condition #2,

"If U is the root of the DFS tree and it has at least 2 children subgraphs disconnected from each other, then U is an articulation point."you can see this same condition in the code, it is marked as`// condition #2`

.I suggest you to do some simulation by hand so you can observe this better. However, a quick explanation would be that whenever we find a visited node, then we update the

`low`

of all the nodes in the current path with the same discovery time of the visited node found.Can we use " low[u] = min(low[u], low[v]) " while finding bridges, I am not able to draw a case where it will not work while finding bridges? Thanks

I am not able to draw case either. Which makes sense to me since the condition to find a bridge is

`disc[u] < low[v]`

and noticing the strict lesser condition, we can observe that in the case of bridges we don't care about the node that is the root of a cycle, which was the case that we should consider for Articulation Points. In conclusion by the informal proof, when finding just bridges you could use`low[u] = min(low[u], low[v])`

, I suggest you to make a more formal proof of this just to be sure.Thanks

Good explanation ;_;

Does anybody have links to problems based on above approach??

It would be very helpful.

Thanks in advance.

I just added a "problems" section in the post :D

the algorithm of ap doesn't work with graph

`{ {1, 2}, {2, 3}, {3, 1}, }`

. if the dfs starts with 1, 1 will be recorded as articulation point.`if (disc[u] <= low[v])`

needs to be changed to`if (u != p && disc[u] <= low[v])`

in your implementation to identify u is not the root of dfs tree.I just tested the code and it works fine for your test case. No modification needed

Nailed it bro, thanks <3

Why did low[current_node] = ++time;

I mean why did time is assigned to low[current_node] ?

a way to see it is that Time is helping us to also uniquely identify each of the nodes by their discovery time. So, initially what we are doing is assigning

`low[u]`

to be itself`u`

, but later we update`low[u]`

if we find a node that has lower discovery time following DFS traversal. Notice that if we don't find such node then by the definition of low then`low[u]`

must equal`disc[u]`

and hence, the initial assumption will be preserved.Man the representations used are so good and DOPE. Sharing this with my friends.