# Math and Computing Olympiad Practice

Happy New Year, everyone! Let me tell you about the epic New Year's Eve that I had. I got into a fight with the last problem from the December 2016 USA Computing Olympiad contest. I struggled mightily, felt beaten down at times, lost all hope, but I finally overcame. It was a marathon. We started sparring around noon, and I did not vanquish my foe until the final hour of 2017.

Having a long weekend in a strange new city, I've had to get creative with things to do. I decided to tackle some olympiad problems. For those who are not familiar with the competitive math or programming scene, the USAMO and USACO are math and programming contests targeted towards high school students.

So, as an old man, what am I doing whittling away precious hours tackling these problems? I wish that I could say that I was reliving my glory days from high school. But truth be told, I've always been a lackluster student, who did the minimal effort necessary. I can't recall ever having written a single line of code in high school, and I maybe solved 2 or 3 AIME problems (10 years later, I can usually do the first 10 with some consistency, the rest are a toss-up). Of course, I never trained for the competitions, so who knows if I could have potentially have done well.

We all have regrets from our youth. For me, I have all the familiar ones: mistreating people, lost friends, not having the best relationship with my parents, losing tennis matches, quitting the violin, and of course, the one girl that got away. However, what I really regret the most was not having pursued math and computer science earlier. I'm not sure why. Even now, 10 years older, it's quite clear that I am not talented enough to have competed in the IMO or IOI: I couldn't really hack it as a mathematician, and you can scroll to the very bottom to see my score of 33.

Despite the lack of talent, I just really love problem solving. In many ways it's become an escape for me when I feel lonely and can't make sense of the world. I can get lost in my own abstract world and forget about my physical needs like sleep or food. On solving a problem, I wake up from my stupor, realize that the world has left me behind, and find everyone suddenly married with kids.

There is such triumph in solving a hard problem. Of course, there are times of struggle and hopelessness. Such is my fledging sense of self-worth that it depends on my ability to solve abstract problems that have no basis in reality. Thus, I want to write up my solution to Robotic Cow Herd and 2013 USAMO Problem 2

## Robotic Cow Herd

In the Platinum Division December 2016 contest, there were 3 problems. In contest, I was completely stuck on Lots of Triangles and never had a chance to look at the other 2 problems. This past Friday, I did Team Building in my own time. It took me maybe 3 hours, so I suspect if I started with that problem instead, I could have gotten a decent amount of points on the board.

Yesterday, I attempted Robotic Cow Herd. I was actually able to solve this problem on my own, but I worked on it on and off over a period of 12 hours, so I definitely wouldn't have scored anything in this case.

My solution is quite different than the given solution, which uses binary search. I did actually consider such a solution, but only gave it 5 minutes of though before abandoning it, far too little time to work out the details. Instead, my solution is quite similar to the one that they describe using priority queue before saying such a solution wouldn't be feasible. However, if we are careful about how we fill our queue it can work.

We are charged with assembling $K$ different cows that consist of $N$ components, where each component will have $M$ different types. Each type of component has an associated cost, and cow $A$ is different than cow $B$ if at least one of the components is of a different type.

Of course, we aren't going to try all $M^N$ different cows. It's clear right away that we can take greedy approach, start with the cheapest cow, and get the next cheapest cow by varying a single component. Since each new cow that we make is based on a previous cow, it's only necessary to store the deltas rather than all $N$ components. Naturally, this gives way to a tree representation shown in the title picture.

Each node is a cow prototype. We start with the cheapest cow as the root, and each child consists of a single delta. The cost of a cow can be had by summing the deltas from the root to the node. Now every prototype gives way to $N$ new possible prototypes. $NK$ is just too much to fit in a priority queue. Hence, the official solution says this approach isn't feasible.

However, if we sort our components in the proper order, we know the next two cheapest cows based off this prototype. Moreover, we have to handle a special case, where instead of a cow just generating children, it also generates a sibling. We sort by increasing deltas. In the given sample data, our base cost is $4$, and our delta matrix (not a true matrix) looks like $$\begin{pmatrix} 1 & 0 \\ 2 & 1 & 2 & 2\\ 2 & 2 & 5 \end{pmatrix}.$$

Also, we add our microcontrollers in increasing order to avoid double counting. Now, if we have just added microcontroller $(i,j)$, the cheapest thing to do is to change it to $(i + 1, 0)$ or $(i, j + 1)$. But what about the case, where we want to skip $(i+1,0)$ and add $(i + 2, 0), (i+3,0),\ldots$? Since we're lazy about pushing into our priority queue and only add one child at a time, when a child is removed, we add its sibling in this special case where $j = 0$.

Parent-child relationships are marked with solid lines. Creation of a node is marked with a red arrow. Nodes still in the queue are blue. The number before the colon denotes the rank of the cow. In this case, the cost for 10 cows is $$4 + 5 + 5 + 6 + 6 + 7 + 7 + 7 + 7 + 7 = 61.$$

Dashed lines represent the special case of creating a sibling. The tuple $(1,-,0)$ means we used microcontrollers $(0,1)$ and $(2,0)$. For component $1$, we decided to just use cheapest one. Here's the code.

import java.io.*;
import java.util.*;

public class roboherd {
/**
* Microcontrollers are stored in a matrix-like structure with rows and columns.
* Use row-first ordering.
*/
private static class Position implements Comparable<Position> {
private int row;
private int column;

public Position(int row, int column) {
this.row = row; this.column = column;
}

public int getRow() { return this.row; }

public int getColumn() { return this.column; }

public int compareTo(Position other) {
if (this.getRow() != other.getRow()) return this.getRow() - other.getRow();
return this.getColumn() - other.getColumn();
}

@Override
public String toString() {
return "{" + this.getRow() + ", " + this.getColumn() + "}";
}
}

/**
* Stores the current cost of a cow along with the last microcontroller added. To save space,
* states only store the last delta and obscures the rest of the state in the cost variable.
*/
private static class MicrocontrollerState implements Comparable<MicrocontrollerState> {
private long cost;
private Position position; // the position of the last microcontroller added

public MicrocontrollerState(long cost, Position position) {
this.cost = cost;
this.position = position;
}

public long getCost() { return this.cost; }

public Position getPosition() { return this.position; }

public int compareTo(MicrocontrollerState other) {
if (this.getCost() != other.getCost()) return (int) Math.signum(this.getCost() - other.getCost());
return this.position.compareTo(other.position);
}
}

public static void main(String[] args) throws IOException {
PrintWriter out = new PrintWriter(new BufferedWriter(new FileWriter("roboherd.out")));
int N = Integer.parseInt(st.nextToken()); // number of microcontrollers per cow
int K = Integer.parseInt(st.nextToken()); // number of cows to make
assert 1 <= N && N <= 100000 : N;
assert 1 <= K && K <= 100000 : K;
ArrayList<int[]> P = new ArrayList<int[]>(N); // microcontroller cost deltas
long minCost = 0; // min cost to make all the cows wanted
for (int i = 0; i < N; ++i) {
int M = Integer.parseInt(st.nextToken());
assert 1 <= M && M <= 10 : M;
int[] costs = new int[M];
for (int j = 0; j < M; ++j) {
costs[j] = Integer.parseInt(st.nextToken());
assert 1 <= costs[j] && costs[j] <= 100000000 : costs[j];
}
Arrays.sort(costs);
minCost += costs[0];
// Store deltas, which will only exist if there is more than one type of microcontroller.
if (M > 1) {
int[] costDeltas = new int[M - 1];
for (int j = M - 2; j >= 0; --j) costDeltas[j] = costs[j + 1] - costs[j];
}
}
in.close();
N = P.size(); // redefine N to exclude microcontrollers of only 1 type
--K; // we already have our first cow
// Identify the next best configuration in log(K) time.
PriorityQueue<MicrocontrollerState> pq = new PriorityQueue<MicrocontrollerState>(3*K);
// Order the microcontrollers in such a way that if we were to vary the prototype by only 1,
// the best way to do would be to pick microcontrollers in the order
// (0,0), (0,1),...,(0,M_0-2),(1,0),...,(1,M_1-2),...,(N-1,0),...,(N-1,M_{N-1}-2)
Collections.sort(P, new Comparator<int[]>() {
@Override
public int compare(int[] a, int[] b) {
for (int j = 0; j < Math.min(a.length, b.length); ++j)
if (a[j] != b[j]) return a[j] - b[j];
return a.length - b.length;
}
});
pq.add(new MicrocontrollerState(minCost + P.get(0)[0], new Position(0, 0)));
// Imagine constructing a tree with K nodes, where the root is the cheapest cow. Each node contains
// the delta from its parent. The next cheapest cow can always be had by taking an existing node on
// the tree and varying a single microcontroller.
for (; K > 0; --K) {
MicrocontrollerState currentState = pq.remove(); // get the next best cow prototype.
long currentCost = currentState.getCost();
minCost += currentCost;
int i = currentState.getPosition().getRow();
int j = currentState.getPosition().getColumn();
// Our invariant to avoid double counting is to only add microcontrollers with "greater" position.
// Given a prototype, from our ordering, the best way to vary a single microcontroller is replace
// it with (i,j + 1) or add (i + 1, 0).
if (j + 1 < P.get(i).length) {
pq.add(new MicrocontrollerState(currentCost + P.get(i)[j + 1], new Position(i, j + 1)));
}
if (i + 1 < N) {
// Account for the special case, where we just use the cheapest version of type i microcontrollers.
// Thus, we remove i and add i + 1. This is better than preemptively filling the priority queue.
if (j == 0) pq.add(new MicrocontrollerState(
currentCost - P.get(i)[j] + P.get(i + 1)[0], new Position(i + 1, 0)));
pq.add(new MicrocontrollerState(currentCost + P.get(i + 1)[0], new Position(i + 1, 0)));
}
}
out.println(minCost);
out.close();
}
}


Sorting is $O(NM\log N)$. Polling from the priority queue is $O(K\log K)$ since each node will at most generate 3 additional nodes to put in the priority queue. So, total running time is $O(NM\log N + K\log K)$.

## 2013 USAMO Problem 2

Math has become a bit painful for me. While it was my first love, I have to admit that a bachelor's and master's degree later, I'm a failed mathematician. I've recently overcome my disappointment and decided to persist in learning and practicing math despite my lack of talent. This is the first USAMO problem that I've been able to solve, which I did on Friday. Here's the problem.

For a positive integer $n\geq 3$ plot $n$ equally spaced points around a circle. Label one of them $A$, and place a marker at $A$. One may move the marker forward in a clockwise direction to either the next point or the point after that. Hence there are a total of $2n$ distinct moves available; two from each point. Let $a_n$ count the number of ways to advance around the circle exactly twice, beginning and ending at $A$, without repeating a move. Prove that $a_{n-1}+a_n=2^n$ for all $n\geq 4$.

The solution on the AOPS wiki uses tiling. I use a different strategy that leads to the same result.

Let the points on the cricle be $P_1,P_2, \ldots,P_n$. First, we prove that each point on the circle is visited either $1$ or $2$ times, except for $A = P_1$, which can be visited $3$ times since it's our starting and ending point. It's clear that $2$ times is upper bound for the other points. Suppose a point is never visited, though. We can only move in increments of $1$ and $2$, so if $P_k$ was never visited, we have made a move of $2$ steps from $P_{k-1}$ twice, which is not allowed.

In this way, we can index our different paths by tuples $(m_1,m_2,\ldots,m_n)$, where $m_i$ is which move we make the first time that we visit $P_i$, so $m_i \in \{1,2\}$. Since moves have to be distinct, the second move is determined by the first move. Thus, we have $2^n$ possible paths.

Here are examples of such paths.

Both paths are valid in the sense that no move is repeated. However, we only count the one on the left since after two cycles we must return to $P_1$.

The path on the left is $(1,2,2,2,1)$, which is valid since we end up at $A = P_1$. The path on the right is $(1,1,1,1,1)$, which is invalid, since miss $A = P_1$ the second time. The first step from a point is black, and the second step is blue. The edge labels are the order in which the edges are traversed.

Now, given all the possible paths with distinct moves for a circle with $n - 1$ points, we can generate all the possible paths for a circle with $n$ points by appending a $1$ or a $2$ to the $n - 1$ paths if we consider their representation as a vector of length $n - 1$ of $1$s and $2$s. In this way, the previous $2^{n-1}$ paths become $2^n$ paths.

Now, we can attack the problem in a case-wise manner.

1. Consider an invalid path, $(m_1,m_2,\ldots,m_{n-1})$. All these paths must land at $P_1$ after the first cycle around the circle. Why? Since the path is invalid, that means we touch $P_{n-1}$ in the second cycle and make a jump over $P_1$ by moving $2$ steps. Thus, if we previously touched $P_{n-1},$ we moved to $P_1$ since moves must be distinct. If the first time that we touch $P_{n-1}$ is the second cycle, then, we jumped over it in first cycle by going moving $P_{n-2} \rightarrow P_1$.
1. Make it $(m_1,m_2,\ldots,m_{n-1}, 1)$. This path is now valid. $P_n$ is now where $P_1$ would have been in the first cycle, so we hit $P_n$ and move to $P_1$. Then, we continue as we normally did. Instead of ending like $P_{n-1} \rightarrow P_2$ by jumping over $P_1$, we jump over $P_n$ instead, so we end up making the move $P_{n-1} \rightarrow P_1$ at the end.
2. Make it $(m_1,m_2,\ldots,m_{n-1}, 2)$. This path is now valid. This case is easier. We again touch $P_n$ in the first cycle. Thus, next time we hit $P_n$, we'll make the move $P_n \rightarrow P_1$ since we must make distinct moves. If we don't hit $P_n$ again, that means we jumped $2$ from $P_{n-1}$, which means that we made the move $P_{n - 1} \rightarrow P_1$.
2. Consider an existing valid path, now, $(m_1,m_2,\ldots,m_{n-1})$. There are $a_{n-1}$ of these.

1. Let it be a path where we touch $P_1$ $3$ times.
1. Make it $(m_1,m_2,\ldots,m_{n-1}, 1)$. This path is invalid. $P_n$ will be where $P_1$ was in the first cycle. So, we'll make the move $P_n \rightarrow P_1$ and continue with the same sequence of moves as before. But instead of landing at $P_1$ when the second cycle ends, we'll land at $P_n$, and jump over $P_1$ by making the move $P_n \rightarrow P_2$.
2. Make it $(m_1,m_2,\ldots,m_{n-1}, 2)$. This path is valid. Again, we'll touch $P_n$ in the first cycle, so the next time that we hit $P_n$, we'll move to $P_1$. If we don't touch $P_n$ again, we jump over it onto $P_1$, anyway, by moving $P_{n-1} \rightarrow P_1$.
2. Let it be a path where we touch $P_1$ $2$ times.

1. Make it $(m_1,m_2,\ldots,m_{n-1}, 1)$. This path is valid. Instead of jumping over $P_1$ at the end of the first cycle, we'll be jumping over $P_n$. We must touch $P_n$, eventually, so from there, we'll make the move $P_n \rightarrow P_1$.
2. Make it $(m_1,m_2,\ldots,m_{n-1}, 2)$. This path is invalid. We have the same situation where we skip $P_n$ the first time. Then, we'll have to end up at $P_n$ the second time and make the move $P_{n} \rightarrow P_2$.

In either case, old valid paths lead to $1$ new valid path and $1$ new invalid path.

Thus, we have that $a_n = 2^n - a_{n-1} \Rightarrow \boxed{a_{n - 1} + a_n = 2^n}$ for $n \geq 4$ since old invalid paths lead to $2$ new valid paths and old valid paths lead to $1$ new valid path. And actually, this proof works when $n \geq 3$ even though the problem only asks for $n \geq 4$. Since we have $P_{n-2} \rightarrow P_1$ at one point in the proof, anything with smaller $n$ is nonsense.

Yay, 2017!

# Factor Analysis and Matrix Calculus

Enough about my abs. Back to more important stuff, you know, like math. I've been slowly working my way through Machine Learning: a Probabilistic Perspective.

Since my last post on this topic Nearest Neighbors and Discriminant Analysis, I've gotten to do some cool problems on spam classification, Spam classification using logistic regression and Spam classification with naive Bayes. It's somewhat surprising how logistic regression performs much better than Naive Bayes with less parameters (5.8% versus 11% misclassification rate). Of course, logistic regression is a discriminative model, while Naive Bayes is generative. Estimating the conditional distribution is in some sense a smaller, and hence, easier problem. Generative models do have some advantages, though, especially when there is missing data.

Other problems have been a bit of drag. Now that I'm reading about Latent linear models and Sparse linear models, I've been getting killed by matrix calculus. I've decided to write down some of the more useful identities as a reference to myself. As evidence of how tedious these exercises are, the derivations in the textbooks and solutions manual are riddle with errors.

Some resources:

## Factor Analysis

The basic idea factor analysis model actually seemed quite intuitive when I first saw it. The idea is that underlying data is just a vector independent standard normals, that is, $$\mathbf{z}_i \sim \mathcal{N}(\mathbf{0}, \mathbf{I}_L).$$ However, we actually observe $$\mathbf{x}_i \mid \mathbf{z}_i \sim \mathcal{N}(\boldsymbol\mu + \mathbf{W}\mathbf{z}_i, \boldsymbol\Psi),$$ where $\boldsymbol\Psi$ is diagonal.

In general, I'll denote observed values with $\mathbf{x}_i$ and hidden variables with $\mathbf{z}_i$. Intuitively, I think of $\mathbf{z}_i$ as the "genetics." A single gene may affect many different traits eye color, height, hair color, bicep size, and intelligence. So if we observed 2 genes that affect those 5 traits, the entry $\mathbf{W}_{ij}$ is the effect that gene $j$ has on trait $i$. We'll denote the number of latent factors, the length of $\mathbf{z}_i$, as $L$, the number of observed factors, the length of $\mathbf{x}_i$ as $D$, and finally, the number of observations as $N$. Thus, $\mathbf{W}$ is a $D \times L$ matrix.

But why stop there? To generalize this model, we can consider a mixture of factor analysis models. Now, the underlying data is $(\mathbf{z}_i, q_i),$ where $$q_i \sim \operatorname{Cat}(\pi_1,\pi_2,\ldots,\pi_K),$$ and for each category $k \in \{1,2,\ldots,K\}$, we a separate $\mathbf{W}_k$ and $\boldsymbol\mu_k$, so that $$\mathbf{x}_i \mid (\mathbf{z}_i, q_i = k) \sim \mathcal{N}(\boldsymbol\mu_k + \mathbf{W}_k\mathbf{z}_i, \boldsymbol\Psi).$$

One helpful way to view this is a graphical model, which I've included in the title picture. One can easily sort out the dependencies. The observed variables are shaded. The deterministic parameters are in diamonds. The latent factors are the unshaded circles with thin borders. The parameters that we are trying to estimate are given thick borders, so we want to estimate $\boldsymbol\theta = \left(\mathbf{W}_k, \boldsymbol\mu_k,\boldsymbol\Psi,\pi_k\right)$ in this case.

### Fitting the model with the EM Algorithm

From the graphical model, one can write down the probability or likelihood of the data, $$L(\boldsymbol\theta) = p\left(\mathcal{D} \mid \mathbf{\theta}\right) = \prod_{i=1}^N \mathcal{N}\left(\mathbf{z}_i \mid \mathbf{0}, \mathbf{I}_L\right) \prod_{k^\prime=1}^K\left(\pi_{k^\prime} \mathcal{N}\left(\mathbf{x}_i \mid \mathbf{W}_k\mathbf{z}_i + \boldsymbol\mu_k, \boldsymbol\Psi\right) \right)^{I(q_i = k)}.$$

Typically, one fits models by maximizing this likelihood, or equivalently, the log-likelihood. The problem is that we can't evaluate the function if we don't know $\mathbf{z}_i$ and $q_i$. This is where the expectation–maximization (EM) algorithm comes in. We replace the unknown values with their expectation and then maximize. We do this iteratively until we achieve convergence.

Use the graphical model as a reference, we can plug in the values that are in diamonds or shaded, we are taking the expectation of the terms that involve variables in circles with a thin border, and we are choosing the values for the variables in thick borders such that the likelihood is maximized.

I won't go into the mathematical and convergence properties of this algorithm, but I'll show how it's performed. To take the expectation, we need some value for $\boldsymbol\theta$, so we choose some initial $\boldsymbol\theta_0$. At each iteration, we use $\boldsymbol\theta_l = \left(\pi_k^{(l)},\boldsymbol\mu_k^{(l)},\mathbf{W}_k^{(l)}, \boldsymbol\Psi^{(l)}\right)$ to create a better estimate $\boldsymbol\theta_{l + 1} = \left(\pi_k^{(l+1)},\boldsymbol\mu_k^{(l+1)},\mathbf{W}_k^{(l+1)}, \boldsymbol\Psi^{(l+1)}\right).$

Let's write the log-likelihood \begin{align} l(\boldsymbol\theta) &= \sum_{i=1}^N\log\mathcal{N}\left(\mathbf{z}_i \mid \mathbf{0}, \mathbf{I}_L\right) + \sum_{i=1}^N\sum_{k = 1}^K I(q_i = k)\left[\log\pi_{k} + \log\mathcal{N}\left(\mathbf{x}_i \mid \mathbf{W}_k\mathbf{z}_i + \boldsymbol\mu_k, \boldsymbol\Psi\right)\right] \label{eqn:loglikelihood}\\ &= \sum_{i=1}^N \left[-\frac{L}{2}\log 2\pi -\frac{1}{2}\mathbf{z}_i^\intercal\mathbf{z}_i \right] + \nonumber\\ &\sum_{i=1}^N\sum_{k = 1}^K I(q_i = k)\left[ \log\pi_{k} -\frac{N}{2}\log 2\pi -\frac{1}{2}\log |\boldsymbol\Psi| -\frac{1}{2}\left(\mathbf{x}_i - \mathbf{W}_k\mathbf{z}_i - \boldsymbol\mu_k\right)^\intercal{\boldsymbol\Psi}^{-1}\left(\mathbf{x}_i - \mathbf{W}_k\mathbf{z}_i- \boldsymbol\mu_k\right) \right]. \nonumber \end{align}

We need to eliminate anything with $q_i$ and $\mathbf{z}_i$ by taking expectation. Let's first start with $I(q_i = k).$

\begin{align} \mathbb{E}\left[I(q_i = k) \mid \mathbf{x}_i, \boldsymbol\theta_l\right] &= p(q_i = k \mid \mathbf{x}_i, \boldsymbol\theta_l) \nonumber\\ &= \frac{p(\mathbf{x}_i \mid q_i = k, \boldsymbol\theta_l)p(q_i = k \mid \boldsymbol\theta_l)}{\sum_{k^\prime = 1}^K p(\mathbf{x}_i \mid q_i = k^\prime, \boldsymbol\theta_l)p(q_i = k^\prime \mid \boldsymbol\theta_l)n} \label{eqn:Iq_initial} \end{align} by Bayes' rule.

Recall that $p(q_i = k \mid \boldsymbol\theta_l) = \pi_k^{(l)}$, and \begin{align} p(\mathbf{x}_i \mid q_i = k, \boldsymbol\theta_l) &= \int p(\mathbf{x}_i,\mathbf{z}_i \mid q_i = k, \boldsymbol\theta_l)d\mathbf{z}_i \nonumber\\ &= \int \mathcal{N}\left(\mathbf{x}_i \mid \mathbf{W}_k^{(l)}\mathbf{z}_i + \boldsymbol\mu_k^{(l)}, \boldsymbol\Psi^{(l)}\right)\mathcal{N}\left(\mathbf{z}_i \mid \mathbf{0}, \mathbf{I}_L\right)d\mathbf{z}_i \nonumber\\ &= \mathcal{N}\left( \mathbf{x}_i \mid \boldsymbol\mu_k^{(l)}, \boldsymbol\Psi^{(l)} + \mathbf{W}_k^{(l)}\left(\mathbf{W}_k^{(l)}\right)^\intercal\right) \label{eqn:px} \end{align} by Equation 4.126 of Murphy's textbook. Plugging in Equation \ref{eqn:px} into Equation \ref{eqn:Iq_initial}, we find that $$r_{ik}^{(l)} = \mathbb{E}\left[I(q_i = k) \mid \mathbf{x}_i, \boldsymbol\theta_l\right] = \frac{\pi_k^{(l)}\mathcal{N}\left( \mathbf{x}_i \mid \boldsymbol\mu_k^{(l)}, \boldsymbol\Psi^{(l)} + \mathbf{W}_k^{(l)}\left(\mathbf{W}_k^{(l)}\right)^\intercal\right)} {\sum_{k^\prime=1}^K\pi_{k^\prime}^{(l)}\mathcal{N}\left( \mathbf{x}_i \mid \boldsymbol\mu_{k^\prime}^{(l)}, \boldsymbol\Psi^{(l)} + \mathbf{W}_{k^\prime}^{(l)}\left(\mathbf{W}_{k^\prime}^{(l)}\right)^\intercal\right)}. \label{eqn:Iq}$$

Next, we need to take care of the terms with $\mathbf{z}_i$. To do this, we find the conditional distribution for $\mathbf{z}_i$. Note that we can condition on both $\mathbf{x}_i$ and $q_i$ since we only care about the $\mathbf{z}_i$ terms multiplied by $I(q_i = k)$, for the other $\mathbf{z}_i$ terms disappear when we take the derivative with respect $\pi_k$, $\mathbf{W}_k$, $\boldsymbol\mu_k$, or $\boldsymbol\Psi$.

If we note that $\mathbf{x}_i \mid (\mathbf{z}_i, q_i = k, \boldsymbol\theta_l) \sim \mathcal{N}\left(\mathbf{W}_k^{(l)}\mathbf{z}_i + \boldsymbol\mu_k^{(l)}, \boldsymbol\Psi^{(l)}\right)$, and $\mathbf{z}_i \mid (q_i = k, \boldsymbol\theta_l) \sim \mathcal{N}\left(\mathbf{0}, \mathbf{I}_L\right),$ \begin{align} p(\mathbf{z}_i \mid \mathbf{x}_i, q_i = k,\boldsymbol\theta_l) &= \mathcal{N}\left(\mathbf{z}_i \mid \mathbf{m}_{ik}^{(l)}, \boldsymbol\Sigma_{ik}^{(l)}\right), \\ \text{where}~\boldsymbol\Sigma_{ik}^{(l)} &= \left(\mathbf{I}_L + \left(\mathbf{W}_k^{(l)}\right)^\intercal\left(\boldsymbol\Psi^{(l)}\right)^{-1}\mathbf{W}_k^{(l)}\right)^{-1} \nonumber\\ \text{and}~\mathbf{m}_{ik}^{(l)} &= \boldsymbol\Sigma_{ik}^{(l)} \mathbf{W}_k^{(l)}\left(\boldsymbol\Psi^{(l)}\right)^{-1}\left(\mathbf{x}_i - \boldsymbol\mu_k^{(l)}\right)\nonumber \end{align} by Equation 4.125 in Murphy's textbook.

Now, let's do a couple of things to clean up notation. First, to simply Equation \ref{eqn:loglikelihood}, we'll drop all terms that aren't functions of $\boldsymbol\theta$, so we have $$\tilde{l}(\boldsymbol\theta) = \sum_{i=1}^N\sum_{k = 1}^K I(q_i = k)\left[ \log\pi_{k} -\frac{1}{2}\log |\boldsymbol\Psi| -\frac{1}{2}\left(\mathbf{x}_i - \mathbf{W}_k\mathbf{z}_i - \boldsymbol\mu_k\right)^\intercal{\boldsymbol\Psi}^{-1}\left(\mathbf{x}_i - \mathbf{W}_k\mathbf{z}_i- \boldsymbol\mu_k\right) \right]. \label{eqn:loglikelihood1}$$

In the next step, we define $$\tilde{\mathbf{z}}_i = \begin{pmatrix} \mathbf{z}_i \\ 1 \end{pmatrix},~\text{and}~ \tilde{\mathbf{W}}_k = \begin{pmatrix} \mathbf{W}_k & \boldsymbol\mu_k \end{pmatrix}.$$ Now $\boldsymbol\theta = (\tilde{\mathbf{W}}_k, \boldsymbol\Psi, \pi_k)$, and we can rewrite Equation \ref{eqn:loglikelihood1} as \begin{align} \tilde{l}(\boldsymbol\theta) &= \sum_{i=1}^N\sum_{k = 1}^K I(q_i = k)\left[ \log\pi_{k} -\frac{1}{2}\log |\boldsymbol\Psi| -\frac{1}{2}\left(\mathbf{x}_i - \tilde{\mathbf{W}}_k\tilde{\mathbf{z}}_i\right)^\intercal{\boldsymbol\Psi}^{-1}\left(\mathbf{x}_i - \tilde{\mathbf{W}}_k\tilde{\mathbf{z}}_i\right) \right] \nonumber\\ &= \sum_{i=1}^N\sum_{k = 1}^K I(q_i = k)\left[ \log\pi_{k} -\frac{1}{2}\log |\boldsymbol\Psi| -\frac{1}{2}\left( \mathbf{x}_i^\intercal\boldsymbol\Psi^{-1}\mathbf{x}_i - 2\mathbf{x}_i^\intercal\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\tilde{\mathbf{z}}_i + \tilde{\mathbf{z}}_i^\intercal\tilde{\mathbf{W}}_k^\intercal\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\tilde{\mathbf{z}}_i \right) \right] \nonumber\\ &= \sum_{i=1}^N\sum_{k = 1}^K I(q_i = k)\left[ \log\pi_{k} -\frac{1}{2}\log |\boldsymbol\Psi| -\frac{1}{2}\left( \mathbf{x}_i^\intercal\boldsymbol\Psi^{-1}\mathbf{x}_i - 2\mathbf{x}_i^\intercal\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\tilde{\mathbf{z}}_i + \operatorname{tr}\left(\tilde{\mathbf{W}}_k^\intercal\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\tilde{\mathbf{z}}_i\tilde{\mathbf{z}}_i^\intercal \right)\right) \right] \end{align} by cyclic property the trace.

Now, we note that $$\tilde{\mathbf{z}}_i \mid \left(\mathbf{x}_i, q_i = k,\boldsymbol\theta_l\right) \sim \mathcal{N}\left( \begin{pmatrix} \mathbf{m}_{ik}^{(l)} \\ 1 \end{pmatrix}, \begin{pmatrix} \boldsymbol\Sigma_{ik}^{(l)} & \mathbf{0} \\ \mathbf{0}^\intercal & 0 \end{pmatrix} \right).$$ Using this, we'll have that \begin{align} \mathbf{b}_{ik}^{(l)} &= \mathbb{E}\left[\tilde{\mathbf{z}}_i \mid \mathbf{x}_i ,q_i = k, \boldsymbol\theta_l\right] =\begin{pmatrix} \mathbf{m}_{ik}^{(l)} \\ 1 \end{pmatrix} \\ \mathbf{C}_{ik}^{(l)} &= \mathbb{E}\left[\tilde{\mathbf{z}}_i\tilde{\mathbf{z}}_i^\intercal \mid \mathbf{x}_i ,q_i = k, \boldsymbol\theta_l\right] = \begin{pmatrix} \boldsymbol\Sigma_{ik}^{(l)} & \mathbf{b}_{ik}^{(l)} \\ \left(\mathbf{b}_{ik}^{(l)}\right)^\intercal & 1 \end{pmatrix}. \end{align}

Thus, E-step becomes writing our objective function as $$Q_{\boldsymbol\theta_l}(\boldsymbol\theta) = \sum_{i=1}^N\sum_{k = 1}^K r_{ik}^{(l)}\left[ \log\pi_{k} -\frac{1}{2}\log |\boldsymbol\Psi| -\frac{1}{2}\left( \mathbf{x}_i^\intercal\boldsymbol\Psi^{-1}\mathbf{x}_i - 2\mathbf{x}_i^\intercal\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\mathbf{b}_{ik}^{(l)} + \operatorname{tr}\left(\tilde{\mathbf{W}}_k^\intercal\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\mathbf{C}_{ik}^{(l)} \right)\right) \right]. \label{eqn:estep}$$

We want to maximize $Q$ to obtain $$\boldsymbol\theta_{l+1} = \operatorname*{arg\,max}_{\boldsymbol\theta} Q_{\boldsymbol\theta_l}(\boldsymbol\theta)$$ for the M-step. This can be done by taking derivatives.

For $\pi_k$ this, is not that hard. Let $\pi_K = 1 - \sum_{k=1}^{K-1}\pi_k$, which gives us that $$\frac{\partial}{\partial\pi_k}Q_{\boldsymbol\theta_l}(\boldsymbol\theta) = \sum_{i=1}^N \left(\frac{r_{ik}^{(l)}}{\pi_k} - \frac{r_{iK}^{(l)}}{\pi_K}\right)$$ for $k < K$. Setting this equal to $0$, we can solve for $\hat{\boldsymbol\pi}$. \begin{align*} \hat\pi_K\sum_{i=1}^N r_{ik}^{(l)} &= \hat\pi_k\sum_{i=1}^N r_{iK}^{(l)} \\ \hat\pi_K\sum_{i=1}^N\left(r_{i1}^{(l)} + r_{i2}^{(l)} + \cdots + r_{i,K-1}^{(l)}\right) &= \left(\hat\pi_1 + \hat\pi_2 + \cdots + \hat\pi_{K-1}\right)\sum_{i=1}^N r_{iK}^{(l)} \\ \hat\pi_K\sum_{i=1}^N\left(1 - r_{iK}^{(l)}\right) &= \left(1 - \hat\pi_K\right)\sum_{i=1}^N r_{iK}^{(l)} \\ N\hat\pi_K - \hat\pi_K\sum_{i=1}^N r_{iK}^{(l)} &= \sum_{i=1}^N r_{iK}^{(l)} - \hat\pi_K\sum_{i=1}^N r_{iK}^{(l)} \\ \hat\pi_K &= \frac{1}{N}\sum_{i=1}^N r_{iK}^{(l)}. \end{align*}

By symmetry, we have that $$\pi_k^{(l + 1)} = \hat\pi_k = \frac{1}{N}\sum_{i=1}^N r_{ik}^{(l)} \label{eqn:mpi}$$ for any $k$.

For $\boldsymbol\Psi$, we need several matrix identities. The first one is $$\frac{\partial}{\partial \mathbf{A}} \log |\mathbf{A}| = \left(\mathbf{A}^{-1}\right)^\intercal. \label{eqn:mat_det}$$

To see this, note that we can write $|\mathbf{A}| = \sum_{i=1}^N \left(-1\right)^{i+j}\mathbf{A}_{ij}\left|\mathbf{A}_{-i,-j}\right|$ for any $j$, so we have that \begin{align*} \frac{\partial}{\partial \mathbf{A}_{ij}} \log |\mathbf{A}| &= \frac{1}{|\mathbf{A}|}(-1)^{i+j}\left|\mathbf{A}_{-i,-j}\right| \\ &= \frac{1}{|\mathbf{A}|}\mathbf{C}_{ij} \\ &= \left(\mathbf{A}^{-1}\right)^\intercal_{ij}, \end{align*} where we have used the definition of the matrix inverse in terms of the adjugate matrix, and $\mathbf{C}$ is the cofactor matrix.

Next, we prove that $$\frac{\partial}{\partial \mathbf{A}}\mathbf{x}^\intercal \mathbf{A}\mathbf{y} = \mathbf{x}\mathbf{y}^\intercal. \label{eqn:mat_quad}$$ To see this we rewrite \begin{equation*} \mathbf{x}^\intercal \mathbf{A}\mathbf{y} = \operatorname{tr}\left(\mathbf{x}^\intercal \mathbf{A}\mathbf{y}\right) = \operatorname{tr}\left(\mathbf{A}\mathbf{y}\mathbf{x}^\intercal\right) = \sum_{i=1}^N\sum_{k=1}^N \mathbf{A}_{ik}y_kx_i, \end{equation*} which implies that \begin{equation*} \frac{\partial}{\partial \mathbf{A}_{ij}}\mathbf{x}^\intercal \mathbf{A}\mathbf{y} = x_iy_j. \end{equation*}

Now, the last trick is to rewrite $\log|\boldsymbol\Psi| = -\log\left|\boldsymbol\Psi^{-1}\right|$, and note that the MLE is preserved by parametrization. So, using Equations \ref{eqn:mat_det} and \ref{eqn:mat_quad}, we can take the derivative of Equation \ref{eqn:estep} with respect to $\boldsymbol\Psi^{-1}$ to get \begin{align*} \frac{\partial}{\partial\boldsymbol\Psi^{-1}}Q_{\boldsymbol\theta_l}(\boldsymbol\theta) &= \sum_{i=1}^N\sum_{k = 1}^K r_{ik}^{(l)}\left[ \frac{1}{2}\boldsymbol\Psi -\frac{1}{2}\left(\mathbf{x}_i\mathbf{x}_i^\intercal - 2\tilde{\mathbf{W}}_k\mathbf{b}_{ik}^{(l)}\mathbf{x}_i^\intercal + \tilde{\mathbf{W}}_k\mathbf{C}_{ik}^{(l)}\tilde{\mathbf{W}}_k^\intercal\right) \right]. \end{align*} If we set this equal to $0$, we find that \begin{align*} \hat{\boldsymbol\Psi} = \frac{1}{N}\sum_{i=1}^N\sum_{k = 1}^K r_{ik}^{(l)}\left( \mathbf{x}_i\mathbf{x}_i^\intercal - 2\tilde{\mathbf{W}}_k\mathbf{b}_{ik}^{(l)}\mathbf{x}_i^\intercal + \tilde{\mathbf{W}}_k\mathbf{C}_{ik}^{(l)}\tilde{\mathbf{W}}_k^\intercal \right), \end{align*} where we have used the symmetry of $\boldsymbol\Psi$.

We have two issues. $\boldsymbol\Psi$ is suppose to be diagonal, and we need to choose a value for $\tilde{\mathbf{W}}_k$. To enforce the diagonal constraint, we just take the diagonal of $\hat{\boldsymbol\Psi}$ since that we could have just taken derivatives component-wise. For $\tilde{\mathbf{W}}_k$, we use $\tilde{\mathbf{W}}_k^{(l+1)}$, which turns out to not depend on $\boldsymbol\Psi,$ so we have $$\boldsymbol\Psi^{(l+1)} = \frac{1}{N}\sum_{i=1}^N\sum_{k = 1}^K r_{ik}^{(l)}\operatorname{diag}\left( \mathbf{x}_i\mathbf{x}_i^\intercal - 2\tilde{\mathbf{W}}_k^{(l+1)}\mathbf{b}_{ik}^{(l)}\mathbf{x}_i^\intercal + \tilde{\mathbf{W}}^{(l+1)}_k\mathbf{C}_{ik}^{(l)}\left(\tilde{\mathbf{W}}_k^{(l+1)}\right)^\intercal \right). \label{eqn:mpsi}$$

Now, we need to deal with the various $\tilde{\mathbf{W}}_k$. I'm not going to prove this identity, but we have that $$\frac{\partial}{\partial \mathbf{X}}\operatorname{tr}\left(\mathbf{X}^\intercal \mathbf{B} \mathbf{X}\mathbf{C}\right) = \mathbf{B}\mathbf{X}\mathbf{C} + \mathbf{B}^\intercal \mathbf{X} \mathbf{C}^\intercal, \label{eqn:trw}$$ which is Equation 117 in the The Matrix Cookbook. Taking the derivative of Equation \ref{eqn:estep} with respect to $\tilde{\mathbf{W}}_k$, we get \begin{align} \frac{\partial}{\partial\tilde{\mathbf{W}}_k}Q_{\boldsymbol\theta_l}(\boldsymbol\theta) &= -\frac{1}{2}\sum_{i=1}^N r_{ik}^{(l)} \left( 2\boldsymbol\Psi^{-1}\mathbf{x}_i\left(\mathbf{b}_{ik}^{(l)}\right)^\intercal - \boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\mathbf{C}_{ik}^{(l)} - \boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\mathbf{C}_{ik}^{(l)} \right) \nonumber\\ &= \sum_{i=1}^N r_{ik}^{(l)} \left(\boldsymbol\Psi^{-1}\tilde{\mathbf{W}}_k\mathbf{C}_{ik}^{(l)} - \boldsymbol\Psi^{-1}\mathbf{x}_i\left(\mathbf{b}_{ik}^{(l)}\right)^\intercal \right), \end{align} where we have used the symmetry of $\boldsymbol\Psi$ and $\mathbf{C}_{ik}^{(l)}$. Setting this equal to $0$, we find that $$\tilde{\mathbf{W}}_k^{(l+1)} = \left(\sum_{i=1}^N r_{ik}^{(l)}\mathbf{x}_i\left(\mathbf{b}_{ik}^{(l)}\right)^\intercal\right) \left(\sum_{i=1}^N r_{ik}^{(l)}\mathbf{C}_{ik}^{(l)} \right)^{-1}. \label{eqn:mw}$$

All in all, we combine Equations \ref{eqn:mpi}, \ref{eqn:mpsi}, and \ref{eqn:mw} to get $\boldsymbol\theta_{l+1}$, so our M-step is \begin{align} \pi_k^{(l + 1)} &= \hat\pi_k = \frac{1}{N}\sum_{i=1}^N r_{ik}^{(l)} \\ \tilde{\mathbf{W}}_k^{(l+1)} &= \left(\sum_{i=1}^N r_{ik}^{(l)}\mathbf{x}_i\left(\mathbf{b}_{ik}^{(l)}\right)^\intercal\right) \left(\sum_{i=1}^N r_{ik}^{(l)}\mathbf{C}_{ik}^{(l)} \right)^{-1} \\ \boldsymbol\Psi^{(l+1)} &= \frac{1}{N}\sum_{i=1}^N\sum_{k = 1}^K r_{ik}^{(l)}\operatorname{diag}\left( \mathbf{x}_i\mathbf{x}_i^\intercal - 2\tilde{\mathbf{W}}_k^{(l+1)}\mathbf{b}_{ik}^{(l)}\mathbf{x}_i^\intercal + \tilde{\mathbf{W}}^{(l+1)}_k\mathbf{C}_{ik}^{(l)}\left(\tilde{\mathbf{W}}_k^{(l+1)}\right)^\intercal \right) . \end{align}

## Principal Component Analysis

Now, $\boldsymbol\Psi$ begin diagonal is already a pretty strong assumption. Principal Component Analysis (PCA) makes the even stronger assumption that $\boldsymbol\Psi = \sigma^2 \mathbf{I}_D$. For this reason it's much easier to compute. All it takes is a singular value decomposition (SVD).

A nice application of these methods is Latent Semantic Indexing. Here, we've represented 9 documents as a word count vector. There are nearly 500 words. Using only 2 latent factors, we can cluster the documents.

Documents 1, 2, and 3 are about alien abductions.

Unfortunately, the assumption that the variance does not differ between the dimensions can be a bad one. In Probabilistic Principal Component Analysis versus Factor Analysis, we see how PCA fails to capture the relationship between $x_1$ and $x_2$ since it reduces the variance by focusing on $x_3$.

# Rolling String Hashes and C++ Integers

I rarely apply anything that I've learned from competitive programming to an actual project, but I finally got the chance with Snapstream Searcher. While computing daily correlations between countries (see Country Relationships), we noticed a big spike in Austria and the strength of its relationship with France as seen here. It turns out Wendy's ran an ad with this text.

It's gonna be a tough blow. Don't think about Wendy's spicy chicken. Don't do it. Problem is, not thinking about that spicy goodness makes you think about it even more. So think of something else. Like countries in Europe. France, Austria, hung-a-ry. Hungry for spicy chicken. See, there's no escaping it. Pffft. Who falls for this stuff? And don't forget, kids get hun-gar-y too.

Since commercials are played frequently across a variety of non-related programs, we started seeing some weird results.

My professor Robin Pemantle has this idea of looking at the surrounding text and only counting matches that had different surrounding text. I formalized this notion into something we call contexts. Suppose that we're searching for string $S$. Let $L$ be the $K$ characters the left and $R$ the $K$ characters to the right. Thus, a match in a program is a 3-tuple $(S,L,R)$. We define the following equivalence relation: given $(S,L,R)$ and $(S^\prime,L^\prime,R^\prime)$, $$(S,L,R) \sim (S^\prime,L^\prime,R^\prime) \Leftrightarrow \left(S = S^\prime\right) \wedge \left(\left(L = L^\prime\right) \vee \left(R = R^\prime\right)\right),$$ so we only count a match as new if and only if both the $K$ characters to the left and the $K$ characters to right of the new match differ from all existing matches.

Now, consider the case when we're searching for a lot of patterns (200+ countries) and $K$ is large. Then, we will have a lot of matches, and for each match, we'll be looking at $K$ characters to the left and right. Suppose we have $M$ matches. Then, we're looking at $O(MK)$ extra computation since to compare each $L$ and $R$ with all the old $L^\prime$ and $R^\prime$, we would need to iterate through $K$ characters.

One solution to this is to compute string hashes and compare integers instead. But what good is this if we need to iterate through $K$ characters to compute this hash? This is where the Rabin-Karp rolling hash comes into play.

## Rabin-Karp Rolling Hash

Fix $M$ which will be the number of buckets. Consider a string of length $K$, $S = s_0s_1s_2\cdots s_{K-1}$. Then, for some $A$, relatively prime to $M$, we define our hash function $$H(S) = s_0A^{0} + s_1A^{1} + s_2A^2 + \cdots + s_{K-1}A^{K-1} \pmod M,$$ where $s_i$ is converted to an integer according to ASCII.

Now, suppose we have a text $T$ of length $L$. Define $$C_j = \sum_{i=0}^j t_iA^{i} \pmod{M},$$ and let $T_{i:j}$ be the substring $t_it_{i+1}\cdots t_{j}$, so it's inclusive. Then, $C_j = H(T_{0:j})$, and $$C_j - C_{i - 1} = t_iA^{i} + t_{i+1}A^{i+1} + \cdots + t_jA^j \pmod M,$$ so we have that $$H(T_{i:j}) = t_iA^{0} + A_{i+1}A^{1} + \cdots + t_jA_{j-i} \pmod M = A^{-i}\left(C_j - C_{i-1}\right).$$ In this way, we can compute the hash of any substring by simple arithmetic operations, and the computation time does not depend on the position or length of the substring. Now, there are actually 3 different versions of this algorithm with different running times.

1. In the first version, $M^2 < 2^{32}$. This allows us to precompute all the modular inverses, so we have a $O(1)$ computation to find the hash of a substring. Also, if $M$ is this small, we never have to worry about overflow with 32-bit integers.
2. In the second version, an array of size $M$ fits in memory, so we can still precompute all the modular inverses. Thus, we continue to have a $O(1)$ algorithm. Unfortunately, $M$ is large enough that there may be overflow, so we must use 64-bit integers.
3. Finally, $M$ becomes so large that we cannot fit an array of size $M$ in memory. Then, we have to compute the modular inverse. One way to do this is the extended Euclidean algorithm. If $M$ is prime, we can also use Fermat's little theorem, which gives us that $A^{i}A^{M-i} \equiv A^{M} \equiv 1 \pmod M,$ so we can find $A^{M - i} \pmod{M}$ quickly with some modular exponentiation. Both of these options are $O(\log M).$

Usually, we want to choose $M$ as large as possible to avoid collisions. In our case, if there's a collision, we'll count an extra context, which is not actually a big deal, so we may be willing to compromise on accuracy for faster running time.

Now, every time that we encouter a match, the left and right hash can be quickly computed and compared with existing hashes. However, which version should we choose? We have 4 versions.

1. No hashing, so this just returns the raw match count
2. Large modulus, so we cannot cache the modular inverse
3. Intermediate modulus, so can cache the modular inverse, but we need to use 64-bit integers
4. Small modulus, so we cache the modular inverse and use 32-bit integers

We run these different versions with 3 different queries.

• Query A: {austria} from 2015-8-1 to 2015-8-31
• Query B: ({united kingdom} + {scotland} + {wales} + ({england} !@ {new england})) from 2015-7-1 to 2015-7-31
• Query C: ({united states} + {united states of america} + {usa}) @ {mexico} from 2015-9-1 to 2015-9-30

First, we check for collisions. Here are the number of contexts found for the various hashing algorithms and search queries for $K = 51$.

Hashing Version A B C
1 181 847 75
2 44 332 30
3 44 331 30
4 44 331 30

In version 1 since there's no hashing, that's the raw match count. As we'd expect, hashing greatly reduces the number of matches. Also, there's no collisions until we have a lot of matches (847, in this case). Thus, we might be okay with using a smaller modulus if we get a big speed-up since missing 1 context out of a 1,000 won't change trends too much.

Here's the benchmark results.

Obviously, all versions of hashing are slower than no hashing. Using a small modulus approximately doubles the time, which makes sense, for we're essentially reading the text twice: once for searching and another time for hashing. Using an intermediate modulus adds another 3 seconds. Having to perform modular exponentiation to compute the modular inverse adds less than a second in the large modulus version. Thus, using 64-bit integers versus 32-bit integers is the major cause of the slowdown.

For this reason, we went with the small modulus version despite the occasional collisions that we encouter. The code can be found on GitHub in the StringHasher class.

# Sequential Game of Perfect Information: Nim and More

Consider the game of Nim. The best way to become acquainted is to play Nim: The Game, which I've coded up here. Win some games!

## Solving Nim

Nim falls under a special class of games, in which, we have several independent games (each pile is its own game), perfect information (you and your opponent know everything), and sequentiality (the game always ends). It turns out every game of this type is equivalent, and we can use Nim as a model on how to solve them.

The most general way to find the optimal strategy is exhaustive enumeration, which we can do recursively.

class GameLogic:

def get_next_states(self, current_state):
pass

def is_losing_state(self, state):
pass

def can_move_to_win(gameLogic, current_state):
## take care of base case
if gameLogic.is_losing_state(current_state):
return False
## try all adjacent states, these are our opponent's states
next_states = gameLogic.get_next_states(current_state)
for next_state in next_states:
if can_move_to_win(gameLogic, next_state) is False:
return True # one could possibly return the next move here
## otherwise, we always give our opponent a winning state
return False


Of course exhaustive enumeration quickly becomes infeasible. However, the fact that there exists this type of recursive algorithm informs us that we should be looking at induction to solve Nim.

One way to get some intuition at the solution is to think of heaps of just 1 object. No heaps mean that we've already lost, and 1 heap means that we'll win. 2 heaps must reduce to 1 heap, which puts our opponent in a winning state, so we lose. 3 heaps must reduce to 2 heaps, so we'll win. Essentially, we'll win if there are an odd number of heaps.

Now, if we think about representing the number of objects in a heap as a binary number, we can imagine each binary digit as its own game. For example, imagine heaps of sizes, $(27,16,8,2,7)$. Represented as binary, this looks like \begin{align*} 27 &= (11011)_2 \\ 16 &= (10000)_2 \\ 8 &= (01000)_2 \\ 2 &= (00010)_2 \\ 7 &= (00111)_2. \end{align*} The columns corresponding to the $2$s place and $4$s place have an odd number of $1$s, so we can put our opponent in a losing state by removing $6$ objects from the last heap. \begin{align*} 27 &= (11011)_2 \\ 16 &= (10000)_2 \\ 8 &= (01000)_2 \\ 2 &= (00010)_2 \\ 7 - 6 = 1 &= (00001)_2. \end{align*}

Now, the XOR of all the heaps is $0$, so there are an even number of $1$s in each column. As we can see, we have a general algorithm for doing this. Let $N_1,N_2,\ldots,N_K$ be the size of our heaps. If $S = N_1 \oplus N_2 \oplus \cdots \oplus N_K \neq 0$, then $S$ has a nonzero digit. Consider the leftmost nonzero digit. Since $2^{k+1} > \sum_{j=0}^k 2^j$, we can remove objects such that this digit changes, and we can chose any digits to the right to be whatever is necessary so that the XOR of the heap sizes is $0$. Here's a more formal proof.

### Proof that if $N_1 \oplus N_2 \oplus \cdots \oplus N_K = 0$ we're in a losing state

Suppose there are $K$ heaps. Define $N_k^{(t)}$ to be the number of objects in heap $k$ at turn $t$. Define $S^{(t)} = N_1^{(t)} \oplus N_2^{(t)} \oplus \cdots \oplus N_K^{(t)}$.

We lose when $N_1 = N_2 = \cdots = N_k = 0$, so if $S^{(t)} \neq 0$, the game is still active, and we have not lost. By the above algorithm, we can make it so that $S^{(t+1)} = 0$ for our opponent. Then, any move that our opponent does must necessarily make it so that $S^{(t+2)} \neq 0$. In this manner, our opponent always has $S^{(t + 2s + 1}) = 0$ for all $s$. Thus, either they lose, or they give us a state such that $S^{(t+2s)} \neq 0$, so we never lose. Since the game must end, eventually our opponent loses.

## Sprague-Grundy Theorem

Amazingly this same idea can be applied to a variety of games that meets certain conditions through the Sprague-Grundy Theorem. I actually don't quite under the Wikipedia article, but this is how I see it.

We give every indepedent game a nimber, meaning that it is equivalent to a heap of that size in Nim. Games that are over are assigned the nimber $0$. To find the nimber of a non-terminating game position, we look at the nimbers of all the game positions that we can move to. The nimber of this position is smallest nonnegative integer strictly greater than all the nimbers that we can move to. So if we can move to the nimbers $\{0,1,3\}$, the nimber is $2$.

At any point of the game, each of our $K$ independent games has a nimber $N_k$. We're in a losing state if and only if $S = N_1 \oplus N_2 \oplus \cdots \oplus N_K = 0$.

For the $\Leftarrow$ direction, first suppose that $S^{(t)} = N_1^{(t)} \oplus N_2^{(t)} \oplus \cdots \oplus N_K^{(t)} = 0$. Because of the way that the nimber's are defined we any move that we do changes the nimber of exactly one of the independent games, so $N_k^{(t)} \neq N_k^{(t + 1)}$, for the next game positions consist of nimbers $1,2,\ldots, N_k^{(t)} - 1$. If we can move to $N_k^{(t)}$, then actually the nimber of the current game position is $N_k^{(t)} + 1$, a contradiction. Thus, we have ensured that $S^{(t + 1)} \neq 0$. Since we can always move to smaller nimbers, we can think of nimbers as the number of objects in a heap. In this way, the opponent applies the same algorithm to ensure that $S^{(t + 2s)} = 0$, so we can never put the opponent in a terminating position. Since the game must end, we'll eventually be in the terminating position.

For the $\Rightarrow$ direction, suppose that we're in a losing state. We prove the contrapositive. If $S^{(t)} = N_1^{(t)} \oplus N_2^{(t)} \oplus \cdots \oplus N_K^{(t)} \neq 0$, the game has not terminated, and we can make it so that $S^{(t+1)} = 0$ by construction of the nimbers. Thus, our opponent is always in a losing state, and since the game must terminate, we'll win.

Now, this is all very abstract, so let's look at an actual problem.

## Floor Division Game

Consider the Floor Division Game from CodeChef. This is the problem that motivated me to learn about all this. Let's take a look at the problem statement.

Henry and Derek are waiting on a room, eager to join the Snackdown 2016 Qualifier Round. They decide to pass the time by playing a game.

In this game's setup, they write $N$ positive integers on a blackboard. Then the players take turns, starting with Henry. In a turn, a player selects one of the integers, divides it by $2$, $3$, $4$, $5$ or $6$, and then takes the floor to make it an integer again. If the integer becomes $0$, it is erased from the board. The player who makes the last move wins.

Henry and Derek are very competitive, so aside from wanting to win Snackdown, they also want to win this game. Assuming they play with the optimal strategy, your task is to predict who wins the game.

The independent games aren't too hard to see. We have $N$ of them in the form of the positive integers that we're given. The numbers are written clearly on the blackboard, so we have perfect information. This game is sequential since the numbers must decrease in value.

A first pass naive solutions uses dynamic programming. Each game position is a nonnegative integer. $0$ is the terminating game position, so its nimber is $0$. Each game position can move to at most $5$ new game positions after dividing by $2$, $3$, $4$, $5$ or $6$ and taking the floor. So if we know the nimbers of these $5$ game positions, it's a simple matter to compute the nimber the current game position. Indeed, here's such a solution.

#include <iostream>
#include <string>
#include <unordered_map>
#include <unordered_set>
#include <vector>

using namespace std;

long long computeNimber(long long a, unordered_map<long long, long long> &nimbers) {
if (nimbers.count(a)) return nimbers[a];
if (a == 0LL) return 0LL;
unordered_set<long long> moves;
for (int d = 2; d <= 6; ++d) moves.insert(a/d);
unordered_set<long long> neighboringNimbers;
for (long long nextA : moves) {
neighboringNimbers.insert(computeNimber(nextA, nimbers));
}
long long nimber = 0;
while (neighboringNimbers.count(nimber)) ++nimber;
return nimbers[a] = nimber;
}

string findWinner(const vector<long long> &A, unordered_map<long long, long long> &nimbers) {
long long cumulativeXor = 0;
for (long long a : A) {
cumulativeXor ^= computeNimber(a, nimbers);
}
return cumulativeXor == 0 ? "Derek" : "Henry";
}

int main(int argc, char *argv[]) {
ios::sync_with_stdio(false); cin.tie(NULL);
int T; cin >> T;
unordered_map<long long, long long> nimbers;
nimbers[0] = 0;
for (int t = 0; t < T; ++t) {
int N; cin >> N;
vector<long long> A; A.reserve(N);
for (int n = 0; n < N; ++n) {
long long a; cin >> a;
A.push_back(a);
}
cout << findWinner(A, nimbers) << '\n';
}
cout << flush;
return 0;
}


Unfortunately, in a worst case scenario, we'll have to start computing nimbers from $0$ and to $\max\left(A_1,A_2,\ldots,A_N\right)$. Since $1 \leq A_n \leq 10^{18}$ can be very large, this solution breaks down. We can speed this up with some mathematical induction.

To me, the pattern was not obvious at all. To help discover it, I generated the nimbers for smaller numbers. This is what I found.

Game Positions Nimber Numbers in Interval
$[0,1)$ $0$ $1$
$[1,2)$ $1$ $1$
$[2,4)$ $2$ $2$
$[4,6)$ $3$ $2$
$[6,12)$ $0$ $6$
$[12,24)$ $1$ $12$
$[24,48)$ $2$ $24$
$[48,72)$ $3$ $24$
$[72,144)$ $0$ $72$
$[144,288)$ $1$ $144$
$[288,576)$ $2$ $288$
$[576, 864)$ $3$ $288$
$[864,1728)$ $0$ $864$
$[1728,3456)$ $1$ $1728$
$[3456,6912)$ $2$ $3456$
$[6912, 10368)$ $3$ $3456$
$\vdots$ $\vdots$ $\vdots$

Hopefully, you can start to see some sort of pattern here. We have repeating cycles of $0$s, $1$2, $2$s, and $3$s. Look at the starts of the cycles $0$, $6$, $72$, and $864$. The first cycle is an exception, but the following cycles all start at $6 \cdot 12^k$ for some nonnegative integer $k$.

Also look at the number of $0$s, $1$2, $2$s, and $3$s. Again, with the exception of the transition from the first cycle to the second cycle, the quantity is multiplied by 12. Let $s$ be the cycle start and $L$ be the cycle length. Then, $[s, s + L/11)$ has nimber $0$, $[s + L/11, s + 3L/11)$ has nimber $1$, $[s + 3L/11, s + 7L/11)$ has nimber $2$, and $[s + 7L/11, s + L)$ has nimber $3$.

Now, given that the penalty for wrong submissions on CodeChef is rather light, you could code this up and submit it now, but let's try to rigorously prove it. It's true when $s_0 = 6$ and $L_0 = 66$. So, we have taken care of the base case. Define $s_k = 12^ks_0$ and $L_k = 12^kL_0$. Notice that $L_k$ is always divisible by $11$ since $$L_{k} = s_{k+1} - s_{k} = 12^{k+1}s_0 - 12^{k}s_0 = 12^{k}s_0(12 - 1) = 11 \cdot 12^{k}s_0.$$

Our induction hypothesis is that this pattern holds in the interval $[s_k, s_k + L_k)$. Now, we attack the problem with case analysis.

• Suppose that $x \in \left[s_{k+1}, s_k + \frac{1}{11}L_{k+1}\right)$. We have that $s_{k+1} = 12s_k$ and $L_{k+1} = 12L_k = 12\cdot 11s_k$, so we have that \begin{align*} 12s_k \leq &~~~x < 2 \cdot 12s_k = 2s_{k+1} \\ \left\lfloor\frac{12}{d}s_k\right\rfloor \leq &\left\lfloor\frac{x}{d}\right\rfloor < \left\lfloor\frac{2}{d}s_{k+1}\right\rfloor \\ 2s_k \leq &\left\lfloor\frac{x}{d}\right\rfloor < s_{k+1} \\ s_k + \frac{1}{11}L_k \leq &\left\lfloor\frac{x}{d}\right\rfloor < s_{k+1} \end{align*} since $2 \leq d \leq 6$, and $L_k = 11 \cdot 12^{k}s_0 = 11s_k$. Thus, $\left\lfloor\frac{x}{d}\right\rfloor$ falls entirely in the previous cycle, but it's large enough so it never has the nimber $0$. Thus, the smallest nonnegative integer among next game positions is $0$, so $x$ has the nimber $0$.
• Now, suppose that $x \in \left[s_{k+1} + \frac{1}{11}L_{k+1}, s_{k+1} + \frac{3}{11}L_{k+1}\right)$. Then, we have that \begin{align*} s_{k+1} + \frac{1}{11}L_{k+1} \leq &~~~x < s_{k+1} + \frac{3}{11}L_{k+1} \\ 2s_{k+1} \leq &~~~x < 4s_{k+1} \\ 2 \cdot 12s_{k} \leq &~~~x < 4 \cdot 12s_{k} \\ \left\lfloor \frac{2 \cdot 12}{d}s_{k}\right\rfloor \leq &\left\lfloor \frac{x}{d} \right\rfloor < \left\lfloor\frac{4 \cdot 12}{d}s_{k}\right\rfloor \\ s_k + 3s_k = 4s_k \leq &\left\lfloor \frac{x}{d} \right\rfloor < 24s_k = 12s_k + 12s_k = s_{k+1} + s_{k+1} \\ s_k + \frac{3}{11}L_k \leq &\left\lfloor \frac{x}{d} \right\rfloor < s_{k+1} + \frac{1}{11}L_{k+1}. \end{align*} Thus, $\left\lfloor \frac{x}{d} \right\rfloor$ lies in both the previous cycle and current cycle. In the previous cycle it lies in the part with nimbers $2$ and $3$. In the current cycle, we're in the part with nimber $0$. In fact, if we let $d = 2$, we have that \begin{equation*} s_{k+1} \leq \left\lfloor \frac{x}{2} \right\rfloor < s_{k+1} + \frac{1}{11}L_{k+1}, \end{equation*} so we can always reach a game position with nimber $0$. Since we can never reach a game position with nimber $1$, this game position has nimber $1$.
• Suppose that $x \in \left[s_{k+1} + \frac{3}{11}L_{k+1}, s_{k+1} + \frac{7}{11}L_{k+1}\right)$. We follow the same ideas, here. \begin{align*} s_{k+1} + \frac{3}{11}L_{k+1} \leq &~~~x < s_{k+1} + \frac{7}{11}L_{k+1} \\ 4s_{k+1} \leq &~~~x < 8s_{k+1} \\ 8s_{k} \leq &\left\lfloor \frac{x}{d} \right\rfloor < 4s_{k+1} \\ s_{k} + \frac{7}{11}L_k \leq &\left\lfloor \frac{x}{d} \right\rfloor < s_{k+1} + \frac{3}{11}L_{k+1}, \end{align*} so $\left\lfloor \frac{x}{d} \right\rfloor$ falls in the previous cycle where the nimber is $3$ and in the current cycle where the nimbers are $0$ and $1$. By fixing $d = 2$, we have that $$s_{k+1} + \frac{1}{11}L_{k+1} = 2s_{k+1} \leq \left\lfloor \frac{x}{2} \right\rfloor < 4s_{k+1} = s_{k+1} + frac{3}{11}L_{k+1},$$ so we can always get to a number where the nimber is $1$. By fixing $d = 4$, we $$s_{k+1} \leq \left\lfloor \frac{x}{4} \right\rfloor < 2s_{k+1} = s_{k+1} + \frac{1}{11}L_{k+1},$$ so we can always get to a number where the nimber is $0$. Since a nimber of $2$ is impossible to reach, the current nimber is $2$.
• Finally, the last case is $x \in \left[s_{k+1} + \frac{7}{11}L_{k+1}, s_{k+1} + L_{k+1}\right)$. This case is actually a little different. \begin{align*} s_{k+1} + \frac{7}{11}L_{k+1} \leq &~~~x < s_{k+1} + L_{k+1} \\ 8s_{k+1} \leq &~~~x < 12s_{k+1} \\ s_{k+1} < \left\lfloor \frac{4}{3}s_{k+1} \right\rfloor \leq &\left\lfloor \frac{x}{d} \right\rfloor < 6s_{k+1}, \end{align*} so we're entirely in the current cycle now. If we use, $d = 6$, then \begin{equation*} s_{k+1} < \left\lfloor \frac{4}{3}s_{k+1} \right\rfloor \leq \left\lfloor \frac{x}{6} \right\rfloor < 2s_{k+1} = s_{k+1} + \frac{1}{11}L_{k+1}, \end{equation*} so we can reach nimber $0$. If we use $d = 4$, we have \begin{equation*} s_{k+1} + \frac{1}{11}L_{k+1} = 2s_{k+1} \leq \left\lfloor \frac{x}{4} \right\rfloor < 3s_{k+1} = s_{k+1} + \frac{2}{11}L_{k+1}, \end{equation*} which gives us a nimber of $1$. Finally, if we use $d = 2$, \begin{equation*} s_{k+1} + \frac{3}{11}L_{k+1} \leq 4s_{k+1} \leq\left\lfloor \frac{x}{4} \right\rfloor < 6s_{k+1} = s_{k+1} + \frac{5}{11}L_{k+1}, \end{equation*} so we can get a nimber of $2$, too. This is the largest nimber that we can get since $d \geq 2$, so $x$ must have nimber $3$.

This covers all the cases, so we're done. Here's the complete code for a $O\left(\max(A_k)\log N\right)$ solution.

#include <cmath>
#include <iostream>
#include <string>>
#include <vector>

using namespace std;

long long computeNimber(long long a) {
if (a < 6) { // exceptional cases
if (a < 1) return 0;
if (a < 2) return 1;
if (a < 4) return 2;
return 3;
}
unsigned long long cycleStart = 6;
while (12*cycleStart <= a) cycleStart *= 12;
if (a < 2*cycleStart) return 0;
if (a < 4*cycleStart) return 1;
if (a < 8*cycleStart) return 2;
return 3;
}

string findWinner(const vector<long long> &A) {
long long cumulativeXor = 0;
for (long long a : A) cumulativeXor ^= computeNimber(a);
return cumulativeXor == 0 ? "Derek" : "Henry";
}

int main(int argc, char *argv[]) {
ios::sync_with_stdio(false); cin.tie(NULL);
int T; cin >> T;
for (int t = 0; t < T; ++t) {
int N; cin >> N;
vector<long long> A; A.reserve(N);
for (int n = 0; n < N; ++n) {
long long a; cin >> a;
A.push_back(a);
}
cout << findWinner(A) << '\n';
}
cout << flush;
return 0;
}


# Nearest Neighbors and Discriminant Analysis

To avoid facing the ticking clock, I've decided to read a textbook and start a new project Machine Learning: a Probabilistic Perspective in Python. I've been meaning to learn more about the math behind machine learning and the Python ecosystem for scientific computing, so I've decided to code up various solutions for the textbook in Jupyter notebooks. Here are a couple of the more interesting exercises.

## Cross Validation and Nearest Neighbors

A classic problem in machine learning that is often used to benchmark classification algorithms is digit recognition. The standard dataset is The MNIST database of handwritten digits. A digit is represented as $26 \times 26$ grid of grayscale pixels like the following examples.

Surprisingly, a simple nearest neighbor approach works well despite the curse of dimensionality. When using $1$ neighbor and euclidean distance, we find that the error rate is only 3.8% on 1,000 test cases. Here are some correct predictions.

Of course we get some predictions wrong. Here are some.

The notebook to generate these figures is here, KNN classifier on shuffled MNIST data.

### Model Selection

How should we know how many neighbors to use? For a parametric models, we can pick our models using a maximum likelihood estimate (MLE) or a Bayesian approach, using either the posterior mean or maximum a posteriori probability (MAP) estimate. However, nearest neighbors is a nonparametric model since the number of parameters increases with the amount of data.

To measure model performance, we use empirical measures, that is, we directly measure prediction accuracy. There are a few ways of going about this.

1. We can test the accuracy on the data that we trained on. This is called the training set error. Generally, it's not a very good metric since it's prone to overfitting. For instance, using 1 neighbor leads to 0% error.
2. We can withhold some of our data and call it the test set. We fit our model on the data not in the test set and calculate the misclassification rate on the test set. This is the test set error. It generally gives a good idea how the model will perform with new data, but it cannot be used when you have a limited number of test cases and cannot afford to throw away data.
3. A compromise is the cross validation error. Here, we split our data into $k$ folds. For each fold, we fit our model on the remaining $k - 1$ folds and use the chosen fold as our test set. In this way, we compute $k$ different error rates. Then, we take the average of those error rates.

All three approaches were tried and compared in this notebook, CV for KNN.

The test set error and cross validation error are quite close, which indicates that the cross validation error is a good proxy for the test set error when faced with limited data. The training set error will almost always underpredict the true error rate and is often vulnerable to overfitting. In this rare case, all three error rates actually agree that using 1 neighbor is optional, but usually, model that achieves the best training set error is overfitted to the data and predicts future test cases badly.

## Discriminant Analysis

Some of the simplest models are the various flavors of discriminant analysis. Suppose we have classes $k = 1,2,\ldots,K$. We make $N$ obervations $(\mathbf{x}_i, y_i)$, where $i \in \{1,2,\ldots, N\}$ and $y_i \in \{1,2,\ldots,K\}$. $\mathbf{x}_i$ is our data and $y_i$ is our class label. Based off some new data $\mathbf{x}^\prime$, we would want to predict its class label $y^\prime$.

Discriminant analysis makes the strong assumption that $\mathbf{x}$ is generated from a multivariate normal distribution. The distribution has different parameters for each class, so if $\mathbf{x}$ belongs to class $y = k$, $\left(\mathbf{x} \mid y = k\right) \sim \mathcal{N}(\boldsymbol\mu_k,\Sigma_k)$. An example would be trying to predict the gender of a person after observing their height and weight.

Using the MLE, we can fit a multivariate normal to males as I do in the notebook Whitening versus standardizing.

We can do a similar thing for our female observations. Thus, given an observation $\mathbf{x}$, we have estimated the distribution of $\mathbf{x} \mid y = k$. Now, the distribution of $y$ is just a multinomial distribution, with parameters $\boldsymbol\pi \in \left\{(\pi_1,\pi_2,\ldots, pi_K) \in \mathbb{R}^K : \sum_{k=1}^Kx_k = 1,~0 < x_k < 1\right\}$. The MLE estimate for $\boldsymbol\pi$ is just $$\boldsymbol{\hat{\pi}} = \left(\frac{N_1}{N}, \frac{N_2}{N},\ldots,\frac{N_K}{N}\right),$$ where $N_k$ is the number of our observations of class $k$.

Let $f(\mathbf{x} \mid \boldsymbol\mu,\Sigma)$ be the probability density function of a multivariate normal with mean $boldsymbol\mu$ and covariance $\Sigma$. Now, we apply Bayes' rule which gives us that \begin{align} p(y = k \mid \mathbf{x}) &= \frac{p(\mathbf{x} \mid y = k)p(y=k)}{\sum_{k^\prime = 1}^Kp(\mathbf{x} \mid y = k^\prime)p(y=k^\prime)}\nonumber\\ &= \frac{f(\mathbf{x} \mid \boldsymbol{\hat{\mu}}_k, \hat{\Sigma}_k)\frac{N_k}{N}}{\sum_{k^\prime = 1}^K f(\mathbf{x} \mid \boldsymbol{\hat{\mu}}_{k^\prime}, \hat{\Sigma}_{k^\prime})\frac{N_{k^\prime}}{N}} \nonumber\\ &= \frac{f(\mathbf{x} \mid \boldsymbol{\hat{\mu}}_k, \hat{\Sigma}_k)N_k}{\sum_{k^\prime = 1}^K f(\mathbf{x} \mid \boldsymbol{\hat{\mu}}_{k^\prime}, \hat{\Sigma}_{k^\prime})N_{k^\prime}}. \end{align}

This gives us the quadratic disriminant analysis (QDA) classifier. Now, we can fix $\Sigma_k = \Sigma$ for all $k$, which leads to further cancellations. This gives the linear discriminant analysis (LDA) classifier. The names quadractic and linear come from the shape of boundaries as seen in the notebook LDA/QDA on height/weight data.

In this case, they lead to the same misclassification rate.

See more notebooks as I add them at Machine Learning: a Probabilistic Perspective in Python.

# Some Examples of Math in Competitive Programming

Lately, I've come across several programming competitions with a strong mathematical component. You would think that this would be my strong suit, but I actually struggled on a few of them. For this reason, I'll write about some of the solutions here.

## Sharing Candies

Here's Sharing Candies from CodeChef.

Alvin and Berto have gotten tired of eating chocolates, so now they have decided to eat candies instead.

Alvin has $A$ apple candies, and Berto has $B$ banana candies. (I know, they have weird tastes.) Alvin and Berto always wants the split of candies to be as fair as possible. The problem is, Alvin only wants apple candies and Berto only wants banana candies!

Here comes Chef to the rescue! Chef bought an infinite number of candy packs. There are two types of packs:

• Packs containing exactly $C$ apple candies.
• Packs containing exactly $D$ banana candies.

Chef wants to give some (could be zero) apple candy packs to Alvin and some (could be zero) banana candy packs to Berto in such a way that the absolute difference between the number of candies they have is minimized. What is this minimum absolute difference?

Note that Chef doesn't want to open any pack; he gives each pack in full.

Let $x$ be the number of packs of apple candies that Chef gives Alvin and $y$ be the number of packs of banana candies. The absolute difference can be written $$\left|(A + xC) - (B + yD)\right| = \left|(A - B) + (xC - yD)\right|.$$

Let $d$ be the greatest common denominator of $C$ and $D$. Then, by Bézout's identity, we have that $$xC - yD = kd$$ for any $k$ and some $x$ and $y$. Moreover, every integer solution $(x^\prime,y^\prime)$ belongs to the set $$S_{x,y,k} = \left\{\left(x + l\frac{D}{d}, y + l\frac{C}{d}\right) : l \in \mathbb{Z}\right\}.$$

By choosing large $l$, we can have both $x^\prime \geq 0$ and $y ^\prime \geq 0$, so we have a nonnegative integer solutions. Thus, our solution is $$\min\left(\left|A - B\right| \bmod d, d - \left(\left|A - B\right| \bmod d\right)\right)$$ since those are two numbers closet to $0$ we can get by adding or subtracting $k$ to $A - B$. Note that we don't actually have to calculate $x$ and $y$, so we just find $d$ with the Euclidean algorithm. Here's the code.

#include <algorithm>
#include <cmath>
#include <climits>
#include <iostream>

using namespace std;

long long computeGcd(long long a, long long b) {
if (a < b) swap(a, b);
// now a >= b
if (b == 0) return a;
long long q = a/b;
a -= q*b;
return computeGcd(b, a);
}

long long minimizeDifference(long long A, long long B,
long long C, long long D) {
long long delta = A > B ? A - B : B - A;
long long gcd = computeGcd(C, D);
return min(delta % gcd, gcd - (delta % gcd));
}

int main(int argc, char *argv[]) {
ios::sync_with_stdio(false); cin.tie(NULL);
int T; cin >> T;
for (int t = 0; t < T; ++t) {
long long A, B, C, D;
cin >> A >> B >> C >> D;
cout << minimizeDifference(A, B, C, D) << '\n';
}
cout << flush;
return 0;
}


## Bear and Tower of Cubes

Here's Bear and Tower of Cubes from Codeforces.

Limak is a little polar bear. He plays by building towers from blocks. Every block is a cube with positive integer length of side. Limak has infinitely many blocks of each side length.

A block with side a has volume $a^3$. A tower consisting of blocks with sides $a_1,a_2,\ldots,a_k$  has the total volume $a_1^3 + a_2^3 + \cdots + a_k^3$.

Limak is going to build a tower. First, he asks you to tell him a positive integer $X$ — the required total volume of the tower. Then, Limak adds new blocks greedily, one by one. Each time he adds the biggest block such that the total volume doesn't exceed $X$.

Limak asks you to choose $X$ not greater than $m$. Also, he wants to maximize the number of blocks in the tower at the end (however, he still behaves greedily). Secondarily, he wants to maximize $X$.

Can you help Limak? Find the maximum number of blocks his tower can have and the maximum $X \leq m$ that results this number of blocks.

The key observation to make that I missed is realize that if $a$ is the greatest integer such that $a^3 \leq m$, then we should choose the first block to have length either $a$ or $a-1$.

For a proof of this fact, suppose that we choose our first block to be of length $b$. Then, it must be true that $b^3 \leq X \lneq (b+1)^3$. Our new volume limit is then $X - b^3$ after choosing a block of length $b$. Now, note that $$0 \leq X - b^3 < (b+1)^3 - b^3 = 3b^2 + 3b = 3b(b+1),$$ In this way, the upper bound of our new volume limit $m^\prime = X - b^3$ increases as a function of $b$. Thus, it makes sense to choose $b$ as large as possible. But if we choose $b = a$, then $0 \leq m^\prime \leq m - a^3$ since it's possible that $m$ is not much larger than $a^3$.

Thus, for every volume limit we choose a block of length $a$ or $a - 1$. Since the volume limit decreases quickly, we can just use a brute force recursive solution and keep track of the number of blocks and total volume as we go. Here's the code.

#include <cmath>
#include <iostream>
#include <utility>

using namespace std;

pair<int, long long> findMaxBlocksAndVolumeHelper(long long volumeLimit,
int currentBlocks,
long long currentVolume) {
if (volumeLimit == 0) return make_pair(currentBlocks, currentVolume);
long long maxA = floor(cbrt(volumeLimit));
pair<int, long long> bigBlockState = findMaxBlocksAndVolumeHelper(volumeLimit - maxA*maxA*maxA,
currentBlocks + 1,
currentVolume + maxA*maxA*maxA);
if (maxA > 1) {
pair<int, long long> smallBlockState = findMaxBlocksAndVolumeHelper(maxA*maxA*maxA - 1 - (maxA - 1)*(maxA - 1)*(maxA - 1),
currentBlocks + 1,
currentVolume + (maxA - 1)*(maxA - 1)*(maxA - 1));
if (smallBlockState.first > bigBlockState.first ||
(smallBlockState.first == bigBlockState.first && smallBlockState.second > bigBlockState.second))
return smallBlockState;
}
return bigBlockState;

}

pair<int, long long> findMaxBlocksAndVolume(long long volumeLimit) {
return findMaxBlocksAndVolumeHelper(volumeLimit, 0, 0);
}

int main(int argc, char *argv[]) {
ios::sync_with_stdio(false); cin.tie(NULL);
long long M; cin >> M;
pair<int, long long> blockVolume = findMaxBlocksAndVolume(M);
cout << blockVolume.first << ' ' << blockVolume.second << endl;
return 0;
}


## Longest Increasing Subsequences

In another, CodeChef problem Longest Increasing Subsequences, we make use of Ternary numerical system.

Chef recently learned about the classic Longest Increasing Subsequence problem. However, Chef found out that while the length of the longest increasing subsequence is unique, the longest increasing subsequence itself is not necessarily unique; for example, in the array $[1, 3, 2, 4]$, there are two longest increasing subsequences: $[1, 3, 4]$ and $[1, 2, 4]$.

Chef decided to investigate on this more, and now he has sufficient mastery in it that he was able to come up with a problem:

Given an integer $K$, output an integer $N$ and a permutation of the array $[1, 2,\ldots, N]$ such that there are exactly $K$ longest increasing subsequences. Chef also requires that $1 \leq N \leq 100$, otherwise he found the problem is too easy.

In case there are multiple possible answers, any one will be accepted.

Consider blocks of decreasing sequences $B_1, B_2,\ldots,B_n$, where for all $x \in B_i$ and $y \in B_j$, $x < y$ if $i < j$. For example, we might have $n = 3$ and \begin{align*} B_1 &= [5,4,3,2,1] \\ B_2 &= [8,7,6] \\ B_3 &= [10,9]. \end{align*} If we concatenate these sequences, we have a permutation of $[1,2,...,10]$ such that length of a longest increasing sequence is 3. We can make any such sequence by choosing exactly one number from each block. Thus, the number of such sequences is $5 \times 3 \times 2 = 30$ in this case.

Now imagine all the blocks are of the same size, say $k$. We want to maximize the number of sequences that we can encode with such blocks. Fix $N$. Then, we have about $N/k$ blocks that can represent $f_N(k) = k^{N/k}$ longest increasing sequences with this strategy. We have that $$f_N^\prime(k) = N\exp\left(\frac{N}{k}\log k\right) \frac{1 - \log k}{k^2},$$ so $f$ is maximized when at $e$. Since $k$ must be an integer, we set $k = \lceil e \rceil = 3$. Thus, our block size is fixed to be size $3$.

Now, suppose that we write $$K = d_0 + d_13 + d_23^2 + \cdots + d_n3^n = \sum_{j = 0}^nd_j3^j,$$ where $d_n \neq 0$. Suppose that $K \geq 9$, too. Then, we have $n$ blocks, $B_1,B_2,\ldots,B_n$ of size 3. If $d_n = 2$, we actually let $B_1$ be of size $6$. In this way, by concatenating $B_1,B_2,\ldots,B_n$ we have $d_n3^n$ longest increasing sequences.

Now suppose that $d_j > 0$. We can add $d_j3^j$ sequences by inserting a sequence between $B_{n - j}$ and $B_{n - j + 1}$. If $d_j = 1$, we need to add an increasing sequence of length $n - j$ such that all the numbers are greater than those in $B_{n-j}$ but less than those in $B_{n - j + 1}$. If $d_j = 2$, we add an increasing sequence of length $n - j + 1$ with the same properties, but we transpose the first numbers. As an example, consider $K = 71 = 2 \cdot 3^0 + 2 \cdot 3^1 + 3^2 + 2 \cdot 3^3$. We'll have 3 blocks. Since no $d_j = 0$, we need to interleave a sequence between every block. Thus, our complete sequence will be $$\overbrace{[14,13,12,11,10,9]}^{B_1} [8] \overbrace{[17,16,15]}^{B_2} [6,5,7] \overbrace{[20,19,18]}^{B_3} [2,1,3,4],$$ which gives exactly $K = 71$ longest increasing sequences.

When $K < 9$, we can simple just use the sequence $[K,K-1,\ldots, 1]$. Here's the code.

#include <algorithm>
#include <iostream>
#include <iterator>
#include <vector>

using namespace std;

const int MAX_N = 100;

vector<int> makeSequence(int K) {
if (K <= 8) { // subsequences of length 1
vector<int> sequence(K);
for (int i = 0; i < K; ++i) sequence[i] = K - i;
return sequence;
}
int bitCount = 0;
vector<int> base3K;
do {
base3K.push_back(K % 3);
K /= 3;
} while (K > 0);
/* maxBit this is the length of the longest increasing subsequence,
* K = d_0*3^0 + d_1*3^1 + ... + d_maxBit*3^maxBit
*/
int maxBit = base3K.size() - 1;
int N = 3*maxBit;
if (base3K.back() == 2) N += 3;
for (int i = 0; i <= maxBit - 1; ++i) {
if (base3K[i] > 0) {
N += maxBit - i;
if (base3K[i] == 2) ++N;
}
}
vector<int> sequence(N);
int currentIdx = 1;
int endCursor = N;
for (int i = 0; i < maxBit; ++i) { // interleave to get other ternary
if (base3K[i] > 0) {
int j = endCursor - (maxBit - i);
if (base3K[i] == 2) --j;
for (; j < endCursor; ++j) {
sequence[j] = currentIdx++;
}
endCursor -= maxBit - i;
if (base3K[i] == 2) { // if digit is 2
--endCursor;
swap(sequence[endCursor], sequence[endCursor + 1]);
}
}
sequence[--endCursor] = N - 2;
sequence[--endCursor] = N - 1;
sequence[--endCursor] = N;
N -= 3;
}
if (endCursor > 0) { // first digit in base 3 is 2
sequence[--endCursor] = N - 2;
sequence[--endCursor] = N - 1;
sequence[--endCursor] = N;
N -= 3;
swap(sequence[0], sequence[3]);
swap(sequence[1], sequence[4]);
swap(sequence[2], sequence[5]);
}
return sequence;
}

int main(int argc, char *argv[]) {
ios::sync_with_stdio(false); cin.tie(NULL);
int T; cin >> T;
for (int t = 0; t < T; ++t) {
int K; cin >> K;
vector<int> sequence = makeSequence(K);
cout << sequence.size() << '\n';
copy(sequence.begin(), sequence.end() - 1, ostream_iterator<int>(cout, " "));
cout << sequence.back() << '\n';
}
cout << flush;
return 0;
}


## Chef and Super Array

Another problem from CodeChef is Chef and Super Array.

Chef has a an array $A$ consisting of $N$ elements. He wants to add some elements into the array as per the below mentioned process.

After each minute, Chef iterates over the array in order from left to right, and takes every two neighbouring pair of elements, say $x$ and $y$, he adds a new element $x + y$ in the middle of elements $x$ and $y$.

For example, if initial array $A = \{1, 6, 9\}$.

• After first minute, the array A will be equal to $\{1, \mathbf{7}, 6, \mathbf{15}, 9\}$. Please note that the elements shown in the bold font are the newly added elements during first minute. As you can observe that $7 = 1 + 6$, and $15 = 6 + 9$.
• After second minute, the array will be $\{1, \mathbf{8}, 7, \mathbf{13}, 6, \mathbf{21}, 15, \mathbf{24}, 9\}$. Once again, elements added during the second minute, are shown in bold.

Chef wants to know the sum of elements between $x$th and $y$th positions in the array $A$ (i.e. $A_x + A_{x + 1} + \cdots + A_y$) after $m$ minutes. As the answer could be large, output it modulo $10^9+7 = 1000000007$. Please note that we use $1$-based indexing in the problem.

The important thing to note in this problem is the recursive structure of it. Consider an array $A = \{A_1,A_2,\ldots,A_N\}$. Let $A_i = a$ and $A_{i+1} = b$. Let $S_{a,b}(k)$ be the sum of elements between $a$ and $b$ after $k$ steps of the process. Clearly, $S_{a,b}(0) = 0$. Now, suppose $c$ is between $a$ and $b$. After a step, c appears $3$ times, and we add an additional $a$ and $b$. For example, $\{a,c,b\}$ becomes $\{a, a + c, c, b + c, b\}$. Thus, $S_{a,b}(k + 1) = 3S_{a,b}(k) + (a + b)$. Since we can write $S_{a,b}(0) = (3^0 - 1)\frac{a + b}{2},$ we have that in general, $$S_{a,b}(k) = \left(3^k - 1\right)\frac{a + b}{2}. \label{eqn:sum_between}$$

Now if we use $0$-indexing, element $i$ of array $A$ has index $i2^m$ after $m$ steps. Suppose that we want to sum elements up to index $x$. If $i2^m \leq x$, we can simply use Equation \ref{eqn:sum_between} with $a = A_{i-1}$ and $b = A_i$.

What about the case when $(i-1)2^m \leq x < i2^m$ in general? Let $a = A_{i-1}$, $b = A_i$ and $c = a + b$. Set $x^\prime = x - (i-1)2^m$. Let $T_{a,b,m,x^\prime}$ be the sum of elements with indices from $(i-1)2^m$ to $x$. We have that $$T_{a,b,m,x^\prime} = \begin{cases} a, &x^\prime = 0 \\ a + \left(3^m - 1\right)\frac{a + b}{2}, &x^\prime = 2^m - 1 \\ T_{a,c,m - 1, x^\prime}, &x^\prime < 2^{m - 1} \\ a + \left(3^{m - 1} - 1\right)\frac{a + c}{2} + T_{a,c,m - 1, x^\prime - 2^{m - 1}}, &x^\prime \geq 2^{m - 1} \end{cases}$$ since we can imagine that the process starts after $1$ step and reaches this point after $m - 1$ steps. Here's the code for this.

#include <algorithm>
#include <iostream>
#include <iterator>
#include <vector>

using namespace std;

const int MOD = 1000000007;
const int MAX_M = 30;

long long p2[MAX_M + 1];
long long p3[MAX_M + 1];

/* consider the subarray newA[k],...,newA[l] after m minutes
* where newA[k] = a, newA[l] = b
*/
int subSum(int i, int a, int b, int m) {
if (i == 0) return a;
if (i == p2[m] - 1) return (a + (a + b)*(p3[m] - 1)/2) % MOD;
if (i < p2[m - 1]) return subSum(i, a, a + b, m - 1);
return (subSum(p2[m - 1] - 1, a, a + b, m - 1) + subSum(i - p2[m - 1], a + b, b, m - 1)) % MOD;
}

// find the sum of newA[0], newA[1],...,newA[i]
int cumulativeSum(long long i, const vector<int> &A, int m) {
if (i < 0) return 0;
int idx = 0;
int S = 0;
// in new array A[idx] is located at index idx*2^m
while (idx*p2[m] <= i) {
S += subSum(min(p2[m] - 1, i - idx*p2[m]), A[idx], A[idx + 1], m);
S %= MOD;
++idx;
}
return S;
}

int sum(const vector<int> &A, int m, long long x, long long y) {
int S = cumulativeSum(y, A, m) - cumulativeSum(x - 1, A, m);
S %= MOD;
if (S < 0) S += MOD;
return S;
}

int main(int argc, char *argv[]) {
ios::sync_with_stdio(false); cin.tie(NULL);
// precompute powers of 2 and 3
p2[0] = 1LL; p3[0] = 1LL;
for (int i = 1; i <= MAX_M; ++i) {
p2[i] = p2[i - 1]*2LL; p3[i] = p3[i - 1]*3LL;
}
// run through test cases
int T; cin >> T;
for (int t = 0; t < T; ++t) {
int N, m;
long long x, y;
cin >> N >> m;
cin >> x >> y;
--x; --y; // 0-index
vector<int> A; A.reserve(N + 1);
for (int i = 0; i < N; ++i) {
int a; cin >> a; A.push_back(a);
}