### smax's blog

By smax, 18 months ago, Hey everyone! Usually when I post stuff on CF I just drop an external link to my blog, but this time I would like to also paste the same content natively on CF to see if it leads to more engagement. You can read the exact same article on my blog here.

Also, special thanks to alien_lover and gabrielwu for proofreading.

## Motivation

We will solve this problem.

## Prologue

EDIT: As an aside, some readers have pointed out that this is essentially what's referred to in English as a "Top Tree". The articles I referenced referred to it as an "AAA Tree". I initially assumed they were different, but after skimming the paper in question there indeed seem to be similarities, just differences in what stuff are called.

## Prerequisites

• Supporting Subtree Aggregates (But Not Lazy) with LCT

## Terminology

I will use the same terminology used in the resources linked in the prerequisites section. Here is a complete list of them to ensure we are all on the same page before proceeding:

Terminology

## The Core Idea

I have a LCT, and I store the aggregates of each subtree in virtual subtrees. Any child of a node is either a preferred child or a virtual child. The issue with doing lazy propagation directly on this model is that a node could have several (up to $\mathcal O(n)$) virtual subtrees hanging from it, and we cannot push down the lazy tags to each of its virtual children each time. The fix is surprisingly simple: binarize the tree. This way, when we push down lazy tags, we only have at most two virtual children to push to, and the complexity is fixed. To understand what I mean by binarize, take a look at the diagram of LCTs below: The solid lines represent preferred edges, and the dotted lines are unpreferred/virtual edges. The nodes 2, 7, 1, 3 form a preferred path in that order. Node 1 has both a left and right preferred child, and it has 3 virtual children.

The LCT on the left is what an ordinary LCT might look like. Node 1 has 3 virtual children, which is more than 2. Therefore, we binarize its virtual children by introducing a new fake vertex to connect both 4 and 5. Now as seen in the LCT on the right, each node has at most 2 preferred children and 2 virtual children (up to 4 children in total). So simple!

If only... the devil is in the details...

If you were to go and start coding this idea right now, you might realize there are quite few pitfalls to keep in mind while coding. The next few sections will be dedicated to talking about some of the implementation details in depth.

## The Access Method

Since everything in LCTs revolve around access, let's first characterize the access method. Here's what a typical access method might look like:

// tr is a global array storing each of the LCT nodes
// p is the parent and ch is a size 4 array of its children
void attach(int u, int d, int v) {
tr[u].ch[d] = v;
tr[v].p = u;
pull(u);
}

// adds v as a virtual child of u
void add(int u, int v) {
tr[u].vir += tr[v].sum;
}

// removes v as a virtual child of u
void rem(int u, int v) {
tr[u].vir -= tr[v].sum;
}

void access(int u) {
splay(u);
add(u, tr[u].ch);        // the preferred path ends at u, so any node with greater depth should be disconnected and made virtual instead
attach(u, 1, 0);            // sets the right preferred child of u to null (0)
while (tr[u].p) {
int v = tr[u].p;
splay(v);
add(v, tr[v].ch);    // disconnect any node with greater depth than v, so result is a preferred path ending at v
rem(v, u);              // u is no longer a virtual child of v
attach(v, 1, u);        // u is now the right preferred child of v
splay(u);
}
}


You'll be glad to hear this isn't far from the final product. The fundamental process of accessing a node remains the same. The only difference is that the add and rem methods become more complex, because we may have to introduce more fake nodes for binarization.

Firstly, let's take a look at add.

// attaches v as a virtual child of u
void add(int u, int v) {
if (!v)
return;
for (int i=2; i<4; i++)
if (!tr[u].ch[i]) {
attach(u, i, v);
return;
}
int w = newFakeNode();
attach(w, 2, tr[u].ch);
attach(w, 3, v);
attach(u, 2, w);
}


The first case is straightforward: if one of our 2 virtual children is null, simply set $v$ as that virtual child instead.

for (int i=2; i<4; i++)
if (!tr[u].ch[i]) {
attach(u, i, v);
return;
}


The second case is when $u$ already has 2 virtual children. In that case, we create a new fake node connecting both $v$ and one of our old virtual children, and substituting that as the new virtual child.

int w = newFakeNode();
attach(w, 2, tr[u].ch);
attach(w, 3, v);
attach(u, 2, w);


The rem method is slightly more complex and requires the introduction of several other concepts first, so we'll come back to that in a minute.

## Bound on Fake Node Creation

Firstly, while we're on the subject of fake nodes, how many fake nodes will we create? If we only create fake nodes without destroying, we could create as many as the number of preferred child changes, which is $\mathcal O(n \log n)$ with significant constant. That's often an undesirable amount of memory to use. Fortunately, observe that at any point, we only need at most $n$ fake nodes to binarize the entire tree. Therefore, as long as we recycle memory and destroy fake nodes in the rem method when they become unnecessary, we will limit our memory usage to just $2n$ nodes.

## Fake Nodes in Our Preferred Paths?

If we just splay willy-nilly in our access method, we might connect fake nodes into our preferred paths. This is undesirable because it becomes messy to keep track of where fake nodes are and when we can destroy them for preserving memory. Thus, we'll need to make the following change to access.

Old Access

Instead of int v = tr[u].p, we will do int v = par(u), where par is a method giving us the lowest ancestor of $u$ that is not a fake node.

int par(int u) {
int v = tr[u].p;
while (tr[v].fake)
v = tr[v].p;
return v;
}


However, this is not good enough. There is no height guarantee on our binary tree formed from fake nodes, so we could be repeating $\mathcal O(n)$ work each time and break complexity. The solution? Make it a splay. So we have two splays: the usual one in ordinary LCT and one on the fake nodes. The new par method would thus look like the following:

int par(int u) {
int v = tr[u].p;
if (!tr[v].fake)
return v;
fakeSplay(v);
return tr[v].p;
}

Technically...

## Fake Splay

There's no need to remake a new set of splay functions for the fake splay cause that's wasteful. Instead, strive to write reusable splay code that works for both versions depending on a parameter passed in. I don't want to get too into the weeds of the splay implementation because that's more about splay trees and less about LCT, and because everyone implements splay differently, so I'll just copy paste my before and after showing how I adapted splay tree code to work for both versions:

Before
After

## How to Do the Lazy Propagation

A first thought on doing lazy propagation is to simply maintain 2 lazy values: one for the path, and one for the subtree. However, it's important to ensure the two lazy values cover a disjoint partition of nodes, because otherwise there's no way to properly order the combination of lazy values affecting the intersection of the two partitions. To clarify what I mean, consider the range set operation applied to a simple array.

$[1, 2, 3, 4, 5]$

Say we range set all values in the interval $[1, 3]$ to $7$, range set the interval $[3, 5]$ to $9$, and then range set the interval $[1, 3]$ again to $10$. Say we maintain two lazy values, one for the interval $[1, 3]$ and one for the interval $[3, 5]$, which would be $9$ and $10$ respectively. The issue is that it isn't obvious what the lazy effect on index $3$ is. In this case, we could maintain the time stamp of both lazy values and use the later one to determine the effect, but you can see how if we use some other lazy operation where intermediate operations, not just the last one, have an effect (e.g. applying an affine function $x := ax + b$ to a range), then this breaks down.

The same applies for the LCT model. If a LCT node has two lazy values, one for the path and one for subtree (in the represented tree), then we need them to cover a disjoint partition of all nodes in the subtree (in the LCT, not in the represented tree). For brevity, let's denote the first lazy value as plazy (short for "path lazy") and the second value as slazy (short for "subtree lazy"). We will also define 3 aggregates in each node: path, sub, and all. path is the standard path aggregate used in ordinary LCT, so it is tr[tr[u].ch].path + tr[tr[u].ch].path + tr[u].val. sub will be everything else not covered in path, so tr[tr[u].ch].sub + tr[tr[u].ch].sub + tr[tr[u].ch].all + tr[tr[u].ch].all. And finally, all is just a combination of both to get everything in this LCT subtree, or tr[u].all = tr[u].path + tr[u].sub. Putting it all together, we get the following pull method for recalculating the aggregates in a node:

void pull(int u) {
if (!tr[u].fake)
tr[u].path = tr[tr[u].ch].path + tr[tr[u].ch].path + tr[u].val;
tr[u].sub = tr[tr[u].ch].sub + tr[tr[u].ch].sub + tr[tr[u].ch].all + tr[tr[u].ch].all;
tr[u].all = tr[u].path + tr[u].sub;
}


Now for pushing down the lazy tags! Pushing plazy is the same as ordinary LCT: push down to the 0th and 1st child. Pushing slazy is slightly less obvious. Specifically, we will only update slazy for the 0th and 1st child, and we will update both plazy and slazy for the 2nd and 3rd child. For the 2nd and 3rd child, we update both lazy values because all values in that LCT subtree represent nodes affected in the real subtree, so both path and sub must be updated. But why don't we update both lazy values in the 0th and 1st child? It's because if we were to receive an update for this entire subtree from the parent, then there are 2 cases:

1. The current node is a preferred child of its parent. In this case, recursively go up until we hit case 2.
2. The current node is a virtual child of its parent. In this case, when we push down from the parent, the current node would have gotten both its plazy and slazy values updated. So the path part of its LCT subtree is already fully updated. If we were to update plazy of its 0th and 1st children again when pushing down from the current node, then we would be applying the update twice to the path. Say node 1 is following case 2, meaning it is a virtual child of its parent. Node 1 just received a tag pushed down from its parent, so its plazy and slazy values are updated. The nodes highlighted in red are the ones already correctly accounted for by plazy. If we were to push down and update node 2's plazy with node 1's slazy as well, then node 2 would be receiving the update twice which is incorrect.

So putting everything together gives us the following push method:

void pushPath(int u, const Lazy &lazy) {
if (!u || tr[u].fake)
return;
tr[u].val += lazy;
tr[u].path += lazy;
tr[u].all = tr[u].path + tr[u].sub;
tr[u].plazy += lazy;
}

void pushSub(int u, bool o, const Lazy &lazy) {
if (!u)
return;
tr[u].sub += lazy;
tr[u].slazy += lazy;
if (!tr[u].fake && o)
pushPath(u, lazy);
else
tr[u].all = tr[u].path + tr[u].sub;
}

void push(int u) {
if (!u)
return;
if (tr[u].plazy.lazy()) {
pushPath(tr[u].ch, tr[u].plazy);
pushPath(tr[u].ch, tr[u].plazy);
tr[u].plazy = Lazy();   // empty constructor for lazy resets it
}
if (tr[u].slazy.lazy()) {
pushSub(tr[u].ch, false, tr[u].slazy);
pushSub(tr[u].ch, false, tr[u].slazy);
pushSub(tr[u].ch, true, tr[u].slazy);
pushSub(tr[u].ch, true, tr[u].slazy);
tr[u].slazy = Lazy();
}
}

Note

## The Rem Method

I promised you we would come back to the rem method. Well, we're finally ready to tackle it!

int dir(int u, int o) {
int v = tr[u].p;
return tr[v].ch[o] == u ? o : tr[v].ch[o+1] == u ? o + 1 : -1;
}

void recPush(int u) {
if (tr[u].fake)
recPush(tr[u].p);
push(u);
}

void rem(int u) {
int v = tr[u].p;
recPush(v);
if (tr[v].fake) {
int w = tr[v].p;
attach(w, dir(v, 2), tr[v].ch[dir(u, 2) ^ 1]);
if (tr[w].fake)
splay(w, 2);    // fake splay
free(v);
} else {
attach(v, dir(u, 2), 0);
}
tr[u].p = 0;
}


What's happening here? Let's break it down. $u$ is the node that we are disconnecting from its parent, $v$. First consider the easier of the two cases:

} else {
attach(v, dir(u, 2), 0);
}


This clause triggers when $v$ is not a fake node. In this case, it's exactly the same as ordinary LCT. Remove $u$ as a virtual child of $v$.

We could handle the second case in the same way, but there's an extra consideration. If $v$ is fake, then after removing $u$, $v$ only has one virtual child and is therefore obsolete. We can destroy the node and attach $v$'s other child directly to $v$'s parent instead! This step is necessary to ensure our number of fake nodes remains under our bound of $n$.

There's one more consideration: correct application of pushes and pulls. Consider the following scenario: We are calling rem on node 4 and attaching it as a preferred child of 1 instead. The red fake node has a pending lazy tag waiting to be pushed down. The left and right diagrams show before and after the procedure.

See the issue? When we remove $u$ and reattach it above, it could "dodge" a lazy tag that it's supposed to receive. So to remedy this, we need to call push on all fake ancestors of $u$ up to the next non-fake node, which is what the method recPush does in my code. Finally, notice that after removing $u$, we would need to call pull again on all fake ancestors up to the next non-fake node to correctly set their values. We could create another method recPull with similar structure to recPush. Or, we could just call splay at the end to correctly set all the node values moving up. Calling splay would also fix any amortized complexity concerns from calling recPush.

And that's it! We've successfully implemented our new version of access!

## The Rest of the Methods

Once you have access, every other method is sincerely trivial. I'll include them here for sake of completeness.

Reroot, link, cut, lca, and path query/update are all completely identical to ordinary LCT.

Recap of Those Methods

Finally, for subtree queries/updates. Say we are querying for the subtree of $u$ given that $r$ is the root. First:

• Reroot $r$
• Access $u$

Now, $u$'s subtree in the represented tree consists of all the virtual subtrees hanging off of $u$, plus $u$ itself. So in other words, tr[tr[u].ch].all + tr[tr[u].ch].all + tr[u].val. For query, we just return that value. For update, we update tr[u].val directly, and then we update both the plazy and slazy values of its two virtual children. We do not touch the 0th or 1st child, since those are not part of $u$'s subtree.

## The Code

I've pasted snippets here and there, but if you're still fuzzy on some of the implementation details, you can see my complete code here.

## Performance Presumably, the complexity of this augmentation of LCT is still $\mathcal O(\log n)$, but with a significant constant factor (this article estimates the constant factor to be $97$). On DMOJ, it runs in around 0.6-0.7 seconds for $n, q \leq 10^5$. On Library Checker, it runs in a little over 1 second for $n, q \leq 2 \cdot 10^5$. So its performance is closer to $\mathcal O(\log^2 n)$ in practice. Some of the implementations in the Chinese articles run faster than mine, but that seems to come at the cost of readability and some strange code, and my implementation is fast enough for almost all reasonable competitive programming purposes.

## Applications ds, who, Comments (16)
 » As a fan of smax blogs and someone who needs more excuses to learn useless algorithms and not to learn binsearch, thank you for the blog!
•  » » yessir, why push rating when you can have fun coding cursed problems instead
 » 18 months ago, # | ← Rev. 2 →   Also, how does this compare to its alternative, the top tree? Isn't top tree just this
•  » » Yeah this is pretty much just top tree: augment LCT with a splay tree of light children. There are a few ways to code it, I think y0105w49 has an implementation without any extra vertices, but each node has up to 6 children. Mine has exactly $2n-1$ nodes, one for each vertex and one for each edge, each node has up to 3 children. (I think both of ours maintain a consistent circular ordering of edges around each vertex, which requires a few extra children in some cases.)
•  » » » Lol that's funny, I've heard of 4-6 children but 3 is a new one (I've usually implemented the 5 child version but maybe I'll switch to yours)
•  » » So I was under the impression these are different because that's what one of the articles I referenced (this one) claimed (unless I mis-translated, which is certainly possible). The Relevant Excerpt花了不少时间仔细读完发现AAA树不是Tarjan所讲的self-adjustingtop tree虽然有非常多的相似处但也有很多不同,比如说AAA树的外层的LCT与SATT的外层compresstree不同2015-03-02 upd:以前一直没有看到过国家集训队2014的论文……没有发现翱犇早就已经讲过了……要是早发现我就不看英文的了……不过我还是坚持认为AAA树不是toptree，这两种数据结构给人的感觉就像是维护静态序列的平衡树和线段树一样……虽然作用一样，实现相似，但是是不同的东西Anyways, after reading ecnerwala's comment, I guess they're apparently slight variations on the same core idea. I'll remove the distinction at the beginning of my post to avoid confusion, thanks!
•  » » » 18 months ago, # ^ | ← Rev. 2 →   There are some variations in how top trees are described. One point of view is as I described, you take LCT (which is dynamic HLD with BBST), and then you also store a BBST of each node's light children. Another point of view you'll sometimes see is described as "compress", which compresses a path of length 2 into a single edge, and "rake", which merges adjacent children of a node. These are essentially equivalent, you can think of the heavy chains as being groups of compress nodes, and the light bbsts as trees of rake nodes.
 » I think the constant 97 was just a little joke, cause the writer Claris has username clrs97. XD
•  » » Oops I feel pretty silly now XD. I was wondering how they calculated such a specific number.
 » doesn't this add an extra $log( n )$, you are going to be splaying the fake splay number of time you call attach , which itself can $O(nlog( n ))$ times, my solution to this was that we will have exactly three children swap them during attach, in case of only link operation add a new fake node
•  » » I don't think so, as analyzing the splay complexity based on assigning unit cost of $\mathcal O(\log n)$ to a single splay and then counting the number of splays doesn't really bound the amortization tightly enough. The complexity analysis of the original LCT uses the access lemma to bound that. Now in the top tree, whether we call the real or fake splay just depends on what type of node we are currently dealing with, and since there are only at most $\mathcal O(n)$ fake nodes at any point, the complexity analysis of all the splay stuff should be the same as the original LCT as access lemma still holds.
•  » » » I think I get your point, but still as the potential function for splay trees is generally taken as the size of sub tree in the auxiliary tree, if we create nodes during attach that could increase the potential function for parent nodes as well
•  » » » » Hmm true, I suppose the potential could increase by $\log n$ per creation of fake node, so bounding it this way is still too naive. Maybe something in the complexity proof of the top tree paper could answer that. Or maybe this implementation is actually $\mathcal O(\log^2 n)$, not sure.
•  » » » » » I think your comment itself proves the bound, you already established a bound on fake nodes to be linear so the increase can’t be more than (nlog(n)) in total
•  » » » » » » No more than $n$ fake nodes can exist simultaneously, but fake nodes can be created and destroyed, and theoretically a fake node can be created as many times as a preferred child changes occurs which is $\mathcal O(n \log n)$, so I'm not sure.
 » Thank you very much for this tutorial Born Strong